From 46d8bcd6627c7fe6af529a0deafe2e8839452ad3 Mon Sep 17 00:00:00 2001 From: Ashok_kumar <74713336+ashok2216-A@users.noreply.github.com> Date: Thu, 7 Nov 2024 12:01:51 +0530 Subject: [PATCH] Update bfq-iosched.c --- block/bfq-iosched.c | 7707 ------------------------------------------- 1 file changed, 7707 deletions(-) diff --git a/block/bfq-iosched.c b/block/bfq-iosched.c index 0747d9d0e48c..8b137891791f 100644 --- a/block/bfq-iosched.c +++ b/block/bfq-iosched.c @@ -1,7708 +1 @@ -// SPDX-License-Identifier: GPL-2.0-or-later -/* - * Budget Fair Queueing (BFQ) I/O scheduler. - * - * Based on ideas and code from CFQ: - * Copyright (C) 2003 Jens Axboe - * - * Copyright (C) 2008 Fabio Checconi - * Paolo Valente - * - * Copyright (C) 2010 Paolo Valente - * Arianna Avanzini - * - * Copyright (C) 2017 Paolo Valente - * - * BFQ is a proportional-share I/O scheduler, with some extra - * low-latency capabilities. BFQ also supports full hierarchical - * scheduling through cgroups. Next paragraphs provide an introduction - * on BFQ inner workings. Details on BFQ benefits, usage and - * limitations can be found in Documentation/block/bfq-iosched.rst. - * - * BFQ is a proportional-share storage-I/O scheduling algorithm based - * on the slice-by-slice service scheme of CFQ. But BFQ assigns - * budgets, measured in number of sectors, to processes instead of - * time slices. The device is not granted to the in-service process - * for a given time slice, but until it has exhausted its assigned - * budget. This change from the time to the service domain enables BFQ - * to distribute the device throughput among processes as desired, - * without any distortion due to throughput fluctuations, or to device - * internal queueing. BFQ uses an ad hoc internal scheduler, called - * B-WF2Q+, to schedule processes according to their budgets. More - * precisely, BFQ schedules queues associated with processes. Each - * process/queue is assigned a user-configurable weight, and B-WF2Q+ - * guarantees that each queue receives a fraction of the throughput - * proportional to its weight. Thanks to the accurate policy of - * B-WF2Q+, BFQ can afford to assign high budgets to I/O-bound - * processes issuing sequential requests (to boost the throughput), - * and yet guarantee a low latency to interactive and soft real-time - * applications. - * - * In particular, to provide these low-latency guarantees, BFQ - * explicitly privileges the I/O of two classes of time-sensitive - * applications: interactive and soft real-time. In more detail, BFQ - * behaves this way if the low_latency parameter is set (default - * configuration). This feature enables BFQ to provide applications in - * these classes with a very low latency. - * - * To implement this feature, BFQ constantly tries to detect whether - * the I/O requests in a bfq_queue come from an interactive or a soft - * real-time application. For brevity, in these cases, the queue is - * said to be interactive or soft real-time. In both cases, BFQ - * privileges the service of the queue, over that of non-interactive - * and non-soft-real-time queues. This privileging is performed, - * mainly, by raising the weight of the queue. So, for brevity, we - * call just weight-raising periods the time periods during which a - * queue is privileged, because deemed interactive or soft real-time. - * - * The detection of soft real-time queues/applications is described in - * detail in the comments on the function - * bfq_bfqq_softrt_next_start. On the other hand, the detection of an - * interactive queue works as follows: a queue is deemed interactive - * if it is constantly non empty only for a limited time interval, - * after which it does become empty. The queue may be deemed - * interactive again (for a limited time), if it restarts being - * constantly non empty, provided that this happens only after the - * queue has remained empty for a given minimum idle time. - * - * By default, BFQ computes automatically the above maximum time - * interval, i.e., the time interval after which a constantly - * non-empty queue stops being deemed interactive. Since a queue is - * weight-raised while it is deemed interactive, this maximum time - * interval happens to coincide with the (maximum) duration of the - * weight-raising for interactive queues. - * - * Finally, BFQ also features additional heuristics for - * preserving both a low latency and a high throughput on NCQ-capable, - * rotational or flash-based devices, and to get the job done quickly - * for applications consisting in many I/O-bound processes. - * - * NOTE: if the main or only goal, with a given device, is to achieve - * the maximum-possible throughput at all times, then do switch off - * all low-latency heuristics for that device, by setting low_latency - * to 0. - * - * BFQ is described in [1], where also a reference to the initial, - * more theoretical paper on BFQ can be found. The interested reader - * can find in the latter paper full details on the main algorithm, as - * well as formulas of the guarantees and formal proofs of all the - * properties. With respect to the version of BFQ presented in these - * papers, this implementation adds a few more heuristics, such as the - * ones that guarantee a low latency to interactive and soft real-time - * applications, and a hierarchical extension based on H-WF2Q+. - * - * B-WF2Q+ is based on WF2Q+, which is described in [2], together with - * H-WF2Q+, while the augmented tree used here to implement B-WF2Q+ - * with O(log N) complexity derives from the one introduced with EEVDF - * in [3]. - * - * [1] P. Valente, A. Avanzini, "Evolution of the BFQ Storage I/O - * Scheduler", Proceedings of the First Workshop on Mobile System - * Technologies (MST-2015), May 2015. - * http://algogroup.unimore.it/people/paolo/disk_sched/mst-2015.pdf - * - * [2] Jon C.R. Bennett and H. Zhang, "Hierarchical Packet Fair Queueing - * Algorithms", IEEE/ACM Transactions on Networking, 5(5):675-689, - * Oct 1997. - * - * http://www.cs.cmu.edu/~hzhang/papers/TON-97-Oct.ps.gz - * - * [3] I. Stoica and H. Abdel-Wahab, "Earliest Eligible Virtual Deadline - * First: A Flexible and Accurate Mechanism for Proportional Share - * Resource Allocation", technical report. - * - * http://www.cs.berkeley.edu/~istoica/papers/eevdf-tr-95.pdf - */ -#include -#include -#include -#include -#include -#include -#include -#include -#include -#include -#include - -#include "elevator.h" -#include "blk.h" -#include "blk-mq.h" -#include "blk-mq-sched.h" -#include "bfq-iosched.h" -#include "blk-wbt.h" - -#define BFQ_BFQQ_FNS(name) \ -void bfq_mark_bfqq_##name(struct bfq_queue *bfqq) \ -{ \ - __set_bit(BFQQF_##name, &(bfqq)->flags); \ -} \ -void bfq_clear_bfqq_##name(struct bfq_queue *bfqq) \ -{ \ - __clear_bit(BFQQF_##name, &(bfqq)->flags); \ -} \ -int bfq_bfqq_##name(const struct bfq_queue *bfqq) \ -{ \ - return test_bit(BFQQF_##name, &(bfqq)->flags); \ -} - -BFQ_BFQQ_FNS(just_created); -BFQ_BFQQ_FNS(busy); -BFQ_BFQQ_FNS(wait_request); -BFQ_BFQQ_FNS(non_blocking_wait_rq); -BFQ_BFQQ_FNS(fifo_expire); -BFQ_BFQQ_FNS(has_short_ttime); -BFQ_BFQQ_FNS(sync); -BFQ_BFQQ_FNS(IO_bound); -BFQ_BFQQ_FNS(in_large_burst); -BFQ_BFQQ_FNS(coop); -BFQ_BFQQ_FNS(split_coop); -BFQ_BFQQ_FNS(softrt_update); -#undef BFQ_BFQQ_FNS \ - -/* Expiration time of async (0) and sync (1) requests, in ns. */ -static const u64 bfq_fifo_expire[2] = { NSEC_PER_SEC / 4, NSEC_PER_SEC / 8 }; - -/* Maximum backwards seek (magic number lifted from CFQ), in KiB. */ -static const int bfq_back_max = 16 * 1024; - -/* Penalty of a backwards seek, in number of sectors. */ -static const int bfq_back_penalty = 2; - -/* Idling period duration, in ns. */ -static u64 bfq_slice_idle = NSEC_PER_SEC / 125; - -/* Minimum number of assigned budgets for which stats are safe to compute. */ -static const int bfq_stats_min_budgets = 194; - -/* Default maximum budget values, in sectors and number of requests. */ -static const int bfq_default_max_budget = 16 * 1024; - -/* - * When a sync request is dispatched, the queue that contains that - * request, and all the ancestor entities of that queue, are charged - * with the number of sectors of the request. In contrast, if the - * request is async, then the queue and its ancestor entities are - * charged with the number of sectors of the request, multiplied by - * the factor below. This throttles the bandwidth for async I/O, - * w.r.t. to sync I/O, and it is done to counter the tendency of async - * writes to steal I/O throughput to reads. - * - * The current value of this parameter is the result of a tuning with - * several hardware and software configurations. We tried to find the - * lowest value for which writes do not cause noticeable problems to - * reads. In fact, the lower this parameter, the stabler I/O control, - * in the following respect. The lower this parameter is, the less - * the bandwidth enjoyed by a group decreases - * - when the group does writes, w.r.t. to when it does reads; - * - when other groups do reads, w.r.t. to when they do writes. - */ -static const int bfq_async_charge_factor = 3; - -/* Default timeout values, in jiffies, approximating CFQ defaults. */ -const int bfq_timeout = HZ / 8; - -/* - * Time limit for merging (see comments in bfq_setup_cooperator). Set - * to the slowest value that, in our tests, proved to be effective in - * removing false positives, while not causing true positives to miss - * queue merging. - * - * As can be deduced from the low time limit below, queue merging, if - * successful, happens at the very beginning of the I/O of the involved - * cooperating processes, as a consequence of the arrival of the very - * first requests from each cooperator. After that, there is very - * little chance to find cooperators. - */ -static const unsigned long bfq_merge_time_limit = HZ/10; - -static struct kmem_cache *bfq_pool; - -/* Below this threshold (in ns), we consider thinktime immediate. */ -#define BFQ_MIN_TT (2 * NSEC_PER_MSEC) - -/* hw_tag detection: parallel requests threshold and min samples needed. */ -#define BFQ_HW_QUEUE_THRESHOLD 3 -#define BFQ_HW_QUEUE_SAMPLES 32 - -#define BFQQ_SEEK_THR (sector_t)(8 * 100) -#define BFQQ_SECT_THR_NONROT (sector_t)(2 * 32) -#define BFQ_RQ_SEEKY(bfqd, last_pos, rq) \ - (get_sdist(last_pos, rq) > \ - BFQQ_SEEK_THR && \ - (!blk_queue_nonrot(bfqd->queue) || \ - blk_rq_sectors(rq) < BFQQ_SECT_THR_NONROT)) -#define BFQQ_CLOSE_THR (sector_t)(8 * 1024) -#define BFQQ_SEEKY(bfqq) (hweight32(bfqq->seek_history) > 19) -/* - * Sync random I/O is likely to be confused with soft real-time I/O, - * because it is characterized by limited throughput and apparently - * isochronous arrival pattern. To avoid false positives, queues - * containing only random (seeky) I/O are prevented from being tagged - * as soft real-time. - */ -#define BFQQ_TOTALLY_SEEKY(bfqq) (bfqq->seek_history == -1) - -/* Min number of samples required to perform peak-rate update */ -#define BFQ_RATE_MIN_SAMPLES 32 -/* Min observation time interval required to perform a peak-rate update (ns) */ -#define BFQ_RATE_MIN_INTERVAL (300*NSEC_PER_MSEC) -/* Target observation time interval for a peak-rate update (ns) */ -#define BFQ_RATE_REF_INTERVAL NSEC_PER_SEC - -/* - * Shift used for peak-rate fixed precision calculations. - * With - * - the current shift: 16 positions - * - the current type used to store rate: u32 - * - the current unit of measure for rate: [sectors/usec], or, more precisely, - * [(sectors/usec) / 2^BFQ_RATE_SHIFT] to take into account the shift, - * the range of rates that can be stored is - * [1 / 2^BFQ_RATE_SHIFT, 2^(32 - BFQ_RATE_SHIFT)] sectors/usec = - * [1 / 2^16, 2^16] sectors/usec = [15e-6, 65536] sectors/usec = - * [15, 65G] sectors/sec - * Which, assuming a sector size of 512B, corresponds to a range of - * [7.5K, 33T] B/sec - */ -#define BFQ_RATE_SHIFT 16 - -/* - * When configured for computing the duration of the weight-raising - * for interactive queues automatically (see the comments at the - * beginning of this file), BFQ does it using the following formula: - * duration = (ref_rate / r) * ref_wr_duration, - * where r is the peak rate of the device, and ref_rate and - * ref_wr_duration are two reference parameters. In particular, - * ref_rate is the peak rate of the reference storage device (see - * below), and ref_wr_duration is about the maximum time needed, with - * BFQ and while reading two files in parallel, to load typical large - * applications on the reference device (see the comments on - * max_service_from_wr below, for more details on how ref_wr_duration - * is obtained). In practice, the slower/faster the device at hand - * is, the more/less it takes to load applications with respect to the - * reference device. Accordingly, the longer/shorter BFQ grants - * weight raising to interactive applications. - * - * BFQ uses two different reference pairs (ref_rate, ref_wr_duration), - * depending on whether the device is rotational or non-rotational. - * - * In the following definitions, ref_rate[0] and ref_wr_duration[0] - * are the reference values for a rotational device, whereas - * ref_rate[1] and ref_wr_duration[1] are the reference values for a - * non-rotational device. The reference rates are not the actual peak - * rates of the devices used as a reference, but slightly lower - * values. The reason for using slightly lower values is that the - * peak-rate estimator tends to yield slightly lower values than the - * actual peak rate (it can yield the actual peak rate only if there - * is only one process doing I/O, and the process does sequential - * I/O). - * - * The reference peak rates are measured in sectors/usec, left-shifted - * by BFQ_RATE_SHIFT. - */ -static int ref_rate[2] = {14000, 33000}; -/* - * To improve readability, a conversion function is used to initialize - * the following array, which entails that the array can be - * initialized only in a function. - */ -static int ref_wr_duration[2]; - -/* - * BFQ uses the above-detailed, time-based weight-raising mechanism to - * privilege interactive tasks. This mechanism is vulnerable to the - * following false positives: I/O-bound applications that will go on - * doing I/O for much longer than the duration of weight - * raising. These applications have basically no benefit from being - * weight-raised at the beginning of their I/O. On the opposite end, - * while being weight-raised, these applications - * a) unjustly steal throughput to applications that may actually need - * low latency; - * b) make BFQ uselessly perform device idling; device idling results - * in loss of device throughput with most flash-based storage, and may - * increase latencies when used purposelessly. - * - * BFQ tries to reduce these problems, by adopting the following - * countermeasure. To introduce this countermeasure, we need first to - * finish explaining how the duration of weight-raising for - * interactive tasks is computed. - * - * For a bfq_queue deemed as interactive, the duration of weight - * raising is dynamically adjusted, as a function of the estimated - * peak rate of the device, so as to be equal to the time needed to - * execute the 'largest' interactive task we benchmarked so far. By - * largest task, we mean the task for which each involved process has - * to do more I/O than for any of the other tasks we benchmarked. This - * reference interactive task is the start-up of LibreOffice Writer, - * and in this task each process/bfq_queue needs to have at most ~110K - * sectors transferred. - * - * This last piece of information enables BFQ to reduce the actual - * duration of weight-raising for at least one class of I/O-bound - * applications: those doing sequential or quasi-sequential I/O. An - * example is file copy. In fact, once started, the main I/O-bound - * processes of these applications usually consume the above 110K - * sectors in much less time than the processes of an application that - * is starting, because these I/O-bound processes will greedily devote - * almost all their CPU cycles only to their target, - * throughput-friendly I/O operations. This is even more true if BFQ - * happens to be underestimating the device peak rate, and thus - * overestimating the duration of weight raising. But, according to - * our measurements, once transferred 110K sectors, these processes - * have no right to be weight-raised any longer. - * - * Basing on the last consideration, BFQ ends weight-raising for a - * bfq_queue if the latter happens to have received an amount of - * service at least equal to the following constant. The constant is - * set to slightly more than 110K, to have a minimum safety margin. - * - * This early ending of weight-raising reduces the amount of time - * during which interactive false positives cause the two problems - * described at the beginning of these comments. - */ -static const unsigned long max_service_from_wr = 120000; - -/* - * Maximum time between the creation of two queues, for stable merge - * to be activated (in ms) - */ -static const unsigned long bfq_activation_stable_merging = 600; -/* - * Minimum time to be waited before evaluating delayed stable merge (in ms) - */ -static const unsigned long bfq_late_stable_merging = 600; - -#define RQ_BIC(rq) ((struct bfq_io_cq *)((rq)->elv.priv[0])) -#define RQ_BFQQ(rq) ((rq)->elv.priv[1]) - -struct bfq_queue *bic_to_bfqq(struct bfq_io_cq *bic, bool is_sync, - unsigned int actuator_idx) -{ - if (is_sync) - return bic->bfqq[1][actuator_idx]; - - return bic->bfqq[0][actuator_idx]; -} - -static void bfq_put_stable_ref(struct bfq_queue *bfqq); - -void bic_set_bfqq(struct bfq_io_cq *bic, - struct bfq_queue *bfqq, - bool is_sync, - unsigned int actuator_idx) -{ - struct bfq_queue *old_bfqq = bic->bfqq[is_sync][actuator_idx]; - - /* - * If bfqq != NULL, then a non-stable queue merge between - * bic->bfqq and bfqq is happening here. This causes troubles - * in the following case: bic->bfqq has also been scheduled - * for a possible stable merge with bic->stable_merge_bfqq, - * and bic->stable_merge_bfqq == bfqq happens to - * hold. Troubles occur because bfqq may then undergo a split, - * thereby becoming eligible for a stable merge. Yet, if - * bic->stable_merge_bfqq points exactly to bfqq, then bfqq - * would be stably merged with itself. To avoid this anomaly, - * we cancel the stable merge if - * bic->stable_merge_bfqq == bfqq. - */ - struct bfq_iocq_bfqq_data *bfqq_data = &bic->bfqq_data[actuator_idx]; - - /* Clear bic pointer if bfqq is detached from this bic */ - if (old_bfqq && old_bfqq->bic == bic) - old_bfqq->bic = NULL; - - if (is_sync) - bic->bfqq[1][actuator_idx] = bfqq; - else - bic->bfqq[0][actuator_idx] = bfqq; - - if (bfqq && bfqq_data->stable_merge_bfqq == bfqq) { - /* - * Actually, these same instructions are executed also - * in bfq_setup_cooperator, in case of abort or actual - * execution of a stable merge. We could avoid - * repeating these instructions there too, but if we - * did so, we would nest even more complexity in this - * function. - */ - bfq_put_stable_ref(bfqq_data->stable_merge_bfqq); - - bfqq_data->stable_merge_bfqq = NULL; - } -} - -struct bfq_data *bic_to_bfqd(struct bfq_io_cq *bic) -{ - return bic->icq.q->elevator->elevator_data; -} - -/** - * icq_to_bic - convert iocontext queue structure to bfq_io_cq. - * @icq: the iocontext queue. - */ -static struct bfq_io_cq *icq_to_bic(struct io_cq *icq) -{ - /* bic->icq is the first member, %NULL will convert to %NULL */ - return container_of(icq, struct bfq_io_cq, icq); -} - -/** - * bfq_bic_lookup - search into @ioc a bic associated to @bfqd. - * @q: the request queue. - */ -static struct bfq_io_cq *bfq_bic_lookup(struct request_queue *q) -{ - struct bfq_io_cq *icq; - unsigned long flags; - - if (!current->io_context) - return NULL; - - spin_lock_irqsave(&q->queue_lock, flags); - icq = icq_to_bic(ioc_lookup_icq(q)); - spin_unlock_irqrestore(&q->queue_lock, flags); - - return icq; -} - -/* - * Scheduler run of queue, if there are requests pending and no one in the - * driver that will restart queueing. - */ -void bfq_schedule_dispatch(struct bfq_data *bfqd) -{ - lockdep_assert_held(&bfqd->lock); - - if (bfqd->queued != 0) { - bfq_log(bfqd, "schedule dispatch"); - blk_mq_run_hw_queues(bfqd->queue, true); - } -} - -#define bfq_class_idle(bfqq) ((bfqq)->ioprio_class == IOPRIO_CLASS_IDLE) - -#define bfq_sample_valid(samples) ((samples) > 80) - -/* - * Lifted from AS - choose which of rq1 and rq2 that is best served now. - * We choose the request that is closer to the head right now. Distance - * behind the head is penalized and only allowed to a certain extent. - */ -static struct request *bfq_choose_req(struct bfq_data *bfqd, - struct request *rq1, - struct request *rq2, - sector_t last) -{ - sector_t s1, s2, d1 = 0, d2 = 0; - unsigned long back_max; -#define BFQ_RQ1_WRAP 0x01 /* request 1 wraps */ -#define BFQ_RQ2_WRAP 0x02 /* request 2 wraps */ - unsigned int wrap = 0; /* bit mask: requests behind the disk head? */ - - if (!rq1 || rq1 == rq2) - return rq2; - if (!rq2) - return rq1; - - if (rq_is_sync(rq1) && !rq_is_sync(rq2)) - return rq1; - else if (rq_is_sync(rq2) && !rq_is_sync(rq1)) - return rq2; - if ((rq1->cmd_flags & REQ_META) && !(rq2->cmd_flags & REQ_META)) - return rq1; - else if ((rq2->cmd_flags & REQ_META) && !(rq1->cmd_flags & REQ_META)) - return rq2; - - s1 = blk_rq_pos(rq1); - s2 = blk_rq_pos(rq2); - - /* - * By definition, 1KiB is 2 sectors. - */ - back_max = bfqd->bfq_back_max * 2; - - /* - * Strict one way elevator _except_ in the case where we allow - * short backward seeks which are biased as twice the cost of a - * similar forward seek. - */ - if (s1 >= last) - d1 = s1 - last; - else if (s1 + back_max >= last) - d1 = (last - s1) * bfqd->bfq_back_penalty; - else - wrap |= BFQ_RQ1_WRAP; - - if (s2 >= last) - d2 = s2 - last; - else if (s2 + back_max >= last) - d2 = (last - s2) * bfqd->bfq_back_penalty; - else - wrap |= BFQ_RQ2_WRAP; - - /* Found required data */ - - /* - * By doing switch() on the bit mask "wrap" we avoid having to - * check two variables for all permutations: --> faster! - */ - switch (wrap) { - case 0: /* common case for CFQ: rq1 and rq2 not wrapped */ - if (d1 < d2) - return rq1; - else if (d2 < d1) - return rq2; - - if (s1 >= s2) - return rq1; - else - return rq2; - - case BFQ_RQ2_WRAP: - return rq1; - case BFQ_RQ1_WRAP: - return rq2; - case BFQ_RQ1_WRAP|BFQ_RQ2_WRAP: /* both rqs wrapped */ - default: - /* - * Since both rqs are wrapped, - * start with the one that's further behind head - * (--> only *one* back seek required), - * since back seek takes more time than forward. - */ - if (s1 <= s2) - return rq1; - else - return rq2; - } -} - -#define BFQ_LIMIT_INLINE_DEPTH 16 - -#ifdef CONFIG_BFQ_GROUP_IOSCHED -static bool bfqq_request_over_limit(struct bfq_queue *bfqq, int limit) -{ - struct bfq_data *bfqd = bfqq->bfqd; - struct bfq_entity *entity = &bfqq->entity; - struct bfq_entity *inline_entities[BFQ_LIMIT_INLINE_DEPTH]; - struct bfq_entity **entities = inline_entities; - int depth, level, alloc_depth = BFQ_LIMIT_INLINE_DEPTH; - int class_idx = bfqq->ioprio_class - 1; - struct bfq_sched_data *sched_data; - unsigned long wsum; - bool ret = false; - - if (!entity->on_st_or_in_serv) - return false; - -retry: - spin_lock_irq(&bfqd->lock); - /* +1 for bfqq entity, root cgroup not included */ - depth = bfqg_to_blkg(bfqq_group(bfqq))->blkcg->css.cgroup->level + 1; - if (depth > alloc_depth) { - spin_unlock_irq(&bfqd->lock); - if (entities != inline_entities) - kfree(entities); - entities = kmalloc_array(depth, sizeof(*entities), GFP_NOIO); - if (!entities) - return false; - alloc_depth = depth; - goto retry; - } - - sched_data = entity->sched_data; - /* Gather our ancestors as we need to traverse them in reverse order */ - level = 0; - for_each_entity(entity) { - /* - * If at some level entity is not even active, allow request - * queueing so that BFQ knows there's work to do and activate - * entities. - */ - if (!entity->on_st_or_in_serv) - goto out; - /* Uh, more parents than cgroup subsystem thinks? */ - if (WARN_ON_ONCE(level >= depth)) - break; - entities[level++] = entity; - } - WARN_ON_ONCE(level != depth); - for (level--; level >= 0; level--) { - entity = entities[level]; - if (level > 0) { - wsum = bfq_entity_service_tree(entity)->wsum; - } else { - int i; - /* - * For bfqq itself we take into account service trees - * of all higher priority classes and multiply their - * weights so that low prio queue from higher class - * gets more requests than high prio queue from lower - * class. - */ - wsum = 0; - for (i = 0; i <= class_idx; i++) { - wsum = wsum * IOPRIO_BE_NR + - sched_data->service_tree[i].wsum; - } - } - if (!wsum) - continue; - limit = DIV_ROUND_CLOSEST(limit * entity->weight, wsum); - if (entity->allocated >= limit) { - bfq_log_bfqq(bfqq->bfqd, bfqq, - "too many requests: allocated %d limit %d level %d", - entity->allocated, limit, level); - ret = true; - break; - } - } -out: - spin_unlock_irq(&bfqd->lock); - if (entities != inline_entities) - kfree(entities); - return ret; -} -#else -static bool bfqq_request_over_limit(struct bfq_queue *bfqq, int limit) -{ - return false; -} -#endif - -/* - * Async I/O can easily starve sync I/O (both sync reads and sync - * writes), by consuming all tags. Similarly, storms of sync writes, - * such as those that sync(2) may trigger, can starve sync reads. - * Limit depths of async I/O and sync writes so as to counter both - * problems. - * - * Also if a bfq queue or its parent cgroup consume more tags than would be - * appropriate for their weight, we trim the available tag depth to 1. This - * avoids a situation where one cgroup can starve another cgroup from tags and - * thus block service differentiation among cgroups. Note that because the - * queue / cgroup already has many requests allocated and queued, this does not - * significantly affect service guarantees coming from the BFQ scheduling - * algorithm. - */ -static void bfq_limit_depth(blk_opf_t opf, struct blk_mq_alloc_data *data) -{ - struct bfq_data *bfqd = data->q->elevator->elevator_data; - struct bfq_io_cq *bic = bfq_bic_lookup(data->q); - int depth; - unsigned limit = data->q->nr_requests; - unsigned int act_idx; - - /* Sync reads have full depth available */ - if (op_is_sync(opf) && !op_is_write(opf)) { - depth = 0; - } else { - depth = bfqd->word_depths[!!bfqd->wr_busy_queues][op_is_sync(opf)]; - limit = (limit * depth) >> bfqd->full_depth_shift; - } - - for (act_idx = 0; bic && act_idx < bfqd->num_actuators; act_idx++) { - struct bfq_queue *bfqq = - bic_to_bfqq(bic, op_is_sync(opf), act_idx); - - /* - * Does queue (or any parent entity) exceed number of - * requests that should be available to it? Heavily - * limit depth so that it cannot consume more - * available requests and thus starve other entities. - */ - if (bfqq && bfqq_request_over_limit(bfqq, limit)) { - depth = 1; - break; - } - } - bfq_log(bfqd, "[%s] wr_busy %d sync %d depth %u", - __func__, bfqd->wr_busy_queues, op_is_sync(opf), depth); - if (depth) - data->shallow_depth = depth; -} - -static struct bfq_queue * -bfq_rq_pos_tree_lookup(struct bfq_data *bfqd, struct rb_root *root, - sector_t sector, struct rb_node **ret_parent, - struct rb_node ***rb_link) -{ - struct rb_node **p, *parent; - struct bfq_queue *bfqq = NULL; - - parent = NULL; - p = &root->rb_node; - while (*p) { - struct rb_node **n; - - parent = *p; - bfqq = rb_entry(parent, struct bfq_queue, pos_node); - - /* - * Sort strictly based on sector. Smallest to the left, - * largest to the right. - */ - if (sector > blk_rq_pos(bfqq->next_rq)) - n = &(*p)->rb_right; - else if (sector < blk_rq_pos(bfqq->next_rq)) - n = &(*p)->rb_left; - else - break; - p = n; - bfqq = NULL; - } - - *ret_parent = parent; - if (rb_link) - *rb_link = p; - - bfq_log(bfqd, "rq_pos_tree_lookup %llu: returning %d", - (unsigned long long)sector, - bfqq ? bfqq->pid : 0); - - return bfqq; -} - -static bool bfq_too_late_for_merging(struct bfq_queue *bfqq) -{ - return bfqq->service_from_backlogged > 0 && - time_is_before_jiffies(bfqq->first_IO_time + - bfq_merge_time_limit); -} - -/* - * The following function is not marked as __cold because it is - * actually cold, but for the same performance goal described in the - * comments on the likely() at the beginning of - * bfq_setup_cooperator(). Unexpectedly, to reach an even lower - * execution time for the case where this function is not invoked, we - * had to add an unlikely() in each involved if(). - */ -void __cold -bfq_pos_tree_add_move(struct bfq_data *bfqd, struct bfq_queue *bfqq) -{ - struct rb_node **p, *parent; - struct bfq_queue *__bfqq; - - if (bfqq->pos_root) { - rb_erase(&bfqq->pos_node, bfqq->pos_root); - bfqq->pos_root = NULL; - } - - /* oom_bfqq does not participate in queue merging */ - if (bfqq == &bfqd->oom_bfqq) - return; - - /* - * bfqq cannot be merged any longer (see comments in - * bfq_setup_cooperator): no point in adding bfqq into the - * position tree. - */ - if (bfq_too_late_for_merging(bfqq)) - return; - - if (bfq_class_idle(bfqq)) - return; - if (!bfqq->next_rq) - return; - - bfqq->pos_root = &bfqq_group(bfqq)->rq_pos_tree; - __bfqq = bfq_rq_pos_tree_lookup(bfqd, bfqq->pos_root, - blk_rq_pos(bfqq->next_rq), &parent, &p); - if (!__bfqq) { - rb_link_node(&bfqq->pos_node, parent, p); - rb_insert_color(&bfqq->pos_node, bfqq->pos_root); - } else - bfqq->pos_root = NULL; -} - -/* - * The following function returns false either if every active queue - * must receive the same share of the throughput (symmetric scenario), - * or, as a special case, if bfqq must receive a share of the - * throughput lower than or equal to the share that every other active - * queue must receive. If bfqq does sync I/O, then these are the only - * two cases where bfqq happens to be guaranteed its share of the - * throughput even if I/O dispatching is not plugged when bfqq remains - * temporarily empty (for more details, see the comments in the - * function bfq_better_to_idle()). For this reason, the return value - * of this function is used to check whether I/O-dispatch plugging can - * be avoided. - * - * The above first case (symmetric scenario) occurs when: - * 1) all active queues have the same weight, - * 2) all active queues belong to the same I/O-priority class, - * 3) all active groups at the same level in the groups tree have the same - * weight, - * 4) all active groups at the same level in the groups tree have the same - * number of children. - * - * Unfortunately, keeping the necessary state for evaluating exactly - * the last two symmetry sub-conditions above would be quite complex - * and time consuming. Therefore this function evaluates, instead, - * only the following stronger three sub-conditions, for which it is - * much easier to maintain the needed state: - * 1) all active queues have the same weight, - * 2) all active queues belong to the same I/O-priority class, - * 3) there is at most one active group. - * In particular, the last condition is always true if hierarchical - * support or the cgroups interface are not enabled, thus no state - * needs to be maintained in this case. - */ -static bool bfq_asymmetric_scenario(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - bool smallest_weight = bfqq && - bfqq->weight_counter && - bfqq->weight_counter == - container_of( - rb_first_cached(&bfqd->queue_weights_tree), - struct bfq_weight_counter, - weights_node); - - /* - * For queue weights to differ, queue_weights_tree must contain - * at least two nodes. - */ - bool varied_queue_weights = !smallest_weight && - !RB_EMPTY_ROOT(&bfqd->queue_weights_tree.rb_root) && - (bfqd->queue_weights_tree.rb_root.rb_node->rb_left || - bfqd->queue_weights_tree.rb_root.rb_node->rb_right); - - bool multiple_classes_busy = - (bfqd->busy_queues[0] && bfqd->busy_queues[1]) || - (bfqd->busy_queues[0] && bfqd->busy_queues[2]) || - (bfqd->busy_queues[1] && bfqd->busy_queues[2]); - - return varied_queue_weights || multiple_classes_busy -#ifdef CONFIG_BFQ_GROUP_IOSCHED - || bfqd->num_groups_with_pending_reqs > 1 -#endif - ; -} - -/* - * If the weight-counter tree passed as input contains no counter for - * the weight of the input queue, then add that counter; otherwise just - * increment the existing counter. - * - * Note that weight-counter trees contain few nodes in mostly symmetric - * scenarios. For example, if all queues have the same weight, then the - * weight-counter tree for the queues may contain at most one node. - * This holds even if low_latency is on, because weight-raised queues - * are not inserted in the tree. - * In most scenarios, the rate at which nodes are created/destroyed - * should be low too. - */ -void bfq_weights_tree_add(struct bfq_queue *bfqq) -{ - struct rb_root_cached *root = &bfqq->bfqd->queue_weights_tree; - struct bfq_entity *entity = &bfqq->entity; - struct rb_node **new = &(root->rb_root.rb_node), *parent = NULL; - bool leftmost = true; - - /* - * Do not insert if the queue is already associated with a - * counter, which happens if: - * 1) a request arrival has caused the queue to become both - * non-weight-raised, and hence change its weight, and - * backlogged; in this respect, each of the two events - * causes an invocation of this function, - * 2) this is the invocation of this function caused by the - * second event. This second invocation is actually useless, - * and we handle this fact by exiting immediately. More - * efficient or clearer solutions might possibly be adopted. - */ - if (bfqq->weight_counter) - return; - - while (*new) { - struct bfq_weight_counter *__counter = container_of(*new, - struct bfq_weight_counter, - weights_node); - parent = *new; - - if (entity->weight == __counter->weight) { - bfqq->weight_counter = __counter; - goto inc_counter; - } - if (entity->weight < __counter->weight) - new = &((*new)->rb_left); - else { - new = &((*new)->rb_right); - leftmost = false; - } - } - - bfqq->weight_counter = kzalloc(sizeof(struct bfq_weight_counter), - GFP_ATOMIC); - - /* - * In the unlucky event of an allocation failure, we just - * exit. This will cause the weight of queue to not be - * considered in bfq_asymmetric_scenario, which, in its turn, - * causes the scenario to be deemed wrongly symmetric in case - * bfqq's weight would have been the only weight making the - * scenario asymmetric. On the bright side, no unbalance will - * however occur when bfqq becomes inactive again (the - * invocation of this function is triggered by an activation - * of queue). In fact, bfq_weights_tree_remove does nothing - * if !bfqq->weight_counter. - */ - if (unlikely(!bfqq->weight_counter)) - return; - - bfqq->weight_counter->weight = entity->weight; - rb_link_node(&bfqq->weight_counter->weights_node, parent, new); - rb_insert_color_cached(&bfqq->weight_counter->weights_node, root, - leftmost); - -inc_counter: - bfqq->weight_counter->num_active++; - bfqq->ref++; -} - -/* - * Decrement the weight counter associated with the queue, and, if the - * counter reaches 0, remove the counter from the tree. - * See the comments to the function bfq_weights_tree_add() for considerations - * about overhead. - */ -void bfq_weights_tree_remove(struct bfq_queue *bfqq) -{ - struct rb_root_cached *root; - - if (!bfqq->weight_counter) - return; - - root = &bfqq->bfqd->queue_weights_tree; - bfqq->weight_counter->num_active--; - if (bfqq->weight_counter->num_active > 0) - goto reset_entity_pointer; - - rb_erase_cached(&bfqq->weight_counter->weights_node, root); - kfree(bfqq->weight_counter); - -reset_entity_pointer: - bfqq->weight_counter = NULL; - bfq_put_queue(bfqq); -} - -/* - * Return expired entry, or NULL to just start from scratch in rbtree. - */ -static struct request *bfq_check_fifo(struct bfq_queue *bfqq, - struct request *last) -{ - struct request *rq; - - if (bfq_bfqq_fifo_expire(bfqq)) - return NULL; - - bfq_mark_bfqq_fifo_expire(bfqq); - - rq = rq_entry_fifo(bfqq->fifo.next); - - if (rq == last || blk_time_get_ns() < rq->fifo_time) - return NULL; - - bfq_log_bfqq(bfqq->bfqd, bfqq, "check_fifo: returned %p", rq); - return rq; -} - -static struct request *bfq_find_next_rq(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - struct request *last) -{ - struct rb_node *rbnext = rb_next(&last->rb_node); - struct rb_node *rbprev = rb_prev(&last->rb_node); - struct request *next, *prev = NULL; - - /* Follow expired path, else get first next available. */ - next = bfq_check_fifo(bfqq, last); - if (next) - return next; - - if (rbprev) - prev = rb_entry_rq(rbprev); - - if (rbnext) - next = rb_entry_rq(rbnext); - else { - rbnext = rb_first(&bfqq->sort_list); - if (rbnext && rbnext != &last->rb_node) - next = rb_entry_rq(rbnext); - } - - return bfq_choose_req(bfqd, next, prev, blk_rq_pos(last)); -} - -/* see the definition of bfq_async_charge_factor for details */ -static unsigned long bfq_serv_to_charge(struct request *rq, - struct bfq_queue *bfqq) -{ - if (bfq_bfqq_sync(bfqq) || bfqq->wr_coeff > 1 || - bfq_asymmetric_scenario(bfqq->bfqd, bfqq)) - return blk_rq_sectors(rq); - - return blk_rq_sectors(rq) * bfq_async_charge_factor; -} - -/** - * bfq_updated_next_req - update the queue after a new next_rq selection. - * @bfqd: the device data the queue belongs to. - * @bfqq: the queue to update. - * - * If the first request of a queue changes we make sure that the queue - * has enough budget to serve at least its first request (if the - * request has grown). We do this because if the queue has not enough - * budget for its first request, it has to go through two dispatch - * rounds to actually get it dispatched. - */ -static void bfq_updated_next_req(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - struct bfq_entity *entity = &bfqq->entity; - struct request *next_rq = bfqq->next_rq; - unsigned long new_budget; - - if (!next_rq) - return; - - if (bfqq == bfqd->in_service_queue) - /* - * In order not to break guarantees, budgets cannot be - * changed after an entity has been selected. - */ - return; - - new_budget = max_t(unsigned long, - max_t(unsigned long, bfqq->max_budget, - bfq_serv_to_charge(next_rq, bfqq)), - entity->service); - if (entity->budget != new_budget) { - entity->budget = new_budget; - bfq_log_bfqq(bfqd, bfqq, "updated next rq: new budget %lu", - new_budget); - bfq_requeue_bfqq(bfqd, bfqq, false); - } -} - -static unsigned int bfq_wr_duration(struct bfq_data *bfqd) -{ - u64 dur; - - dur = bfqd->rate_dur_prod; - do_div(dur, bfqd->peak_rate); - - /* - * Limit duration between 3 and 25 seconds. The upper limit - * has been conservatively set after the following worst case: - * on a QEMU/KVM virtual machine - * - running in a slow PC - * - with a virtual disk stacked on a slow low-end 5400rpm HDD - * - serving a heavy I/O workload, such as the sequential reading - * of several files - * mplayer took 23 seconds to start, if constantly weight-raised. - * - * As for higher values than that accommodating the above bad - * scenario, tests show that higher values would often yield - * the opposite of the desired result, i.e., would worsen - * responsiveness by allowing non-interactive applications to - * preserve weight raising for too long. - * - * On the other end, lower values than 3 seconds make it - * difficult for most interactive tasks to complete their jobs - * before weight-raising finishes. - */ - return clamp_val(dur, msecs_to_jiffies(3000), msecs_to_jiffies(25000)); -} - -/* switch back from soft real-time to interactive weight raising */ -static void switch_back_to_interactive_wr(struct bfq_queue *bfqq, - struct bfq_data *bfqd) -{ - bfqq->wr_coeff = bfqd->bfq_wr_coeff; - bfqq->wr_cur_max_time = bfq_wr_duration(bfqd); - bfqq->last_wr_start_finish = bfqq->wr_start_at_switch_to_srt; -} - -static void -bfq_bfqq_resume_state(struct bfq_queue *bfqq, struct bfq_data *bfqd, - struct bfq_io_cq *bic, bool bfq_already_existing) -{ - unsigned int old_wr_coeff = 1; - bool busy = bfq_already_existing && bfq_bfqq_busy(bfqq); - unsigned int a_idx = bfqq->actuator_idx; - struct bfq_iocq_bfqq_data *bfqq_data = &bic->bfqq_data[a_idx]; - - if (bfqq_data->saved_has_short_ttime) - bfq_mark_bfqq_has_short_ttime(bfqq); - else - bfq_clear_bfqq_has_short_ttime(bfqq); - - if (bfqq_data->saved_IO_bound) - bfq_mark_bfqq_IO_bound(bfqq); - else - bfq_clear_bfqq_IO_bound(bfqq); - - bfqq->last_serv_time_ns = bfqq_data->saved_last_serv_time_ns; - bfqq->inject_limit = bfqq_data->saved_inject_limit; - bfqq->decrease_time_jif = bfqq_data->saved_decrease_time_jif; - - bfqq->entity.new_weight = bfqq_data->saved_weight; - bfqq->ttime = bfqq_data->saved_ttime; - bfqq->io_start_time = bfqq_data->saved_io_start_time; - bfqq->tot_idle_time = bfqq_data->saved_tot_idle_time; - /* - * Restore weight coefficient only if low_latency is on - */ - if (bfqd->low_latency) { - old_wr_coeff = bfqq->wr_coeff; - bfqq->wr_coeff = bfqq_data->saved_wr_coeff; - } - bfqq->service_from_wr = bfqq_data->saved_service_from_wr; - bfqq->wr_start_at_switch_to_srt = - bfqq_data->saved_wr_start_at_switch_to_srt; - bfqq->last_wr_start_finish = bfqq_data->saved_last_wr_start_finish; - bfqq->wr_cur_max_time = bfqq_data->saved_wr_cur_max_time; - - if (bfqq->wr_coeff > 1 && (bfq_bfqq_in_large_burst(bfqq) || - time_is_before_jiffies(bfqq->last_wr_start_finish + - bfqq->wr_cur_max_time))) { - if (bfqq->wr_cur_max_time == bfqd->bfq_wr_rt_max_time && - !bfq_bfqq_in_large_burst(bfqq) && - time_is_after_eq_jiffies(bfqq->wr_start_at_switch_to_srt + - bfq_wr_duration(bfqd))) { - switch_back_to_interactive_wr(bfqq, bfqd); - } else { - bfqq->wr_coeff = 1; - bfq_log_bfqq(bfqq->bfqd, bfqq, - "resume state: switching off wr"); - } - } - - /* make sure weight will be updated, however we got here */ - bfqq->entity.prio_changed = 1; - - if (likely(!busy)) - return; - - if (old_wr_coeff == 1 && bfqq->wr_coeff > 1) - bfqd->wr_busy_queues++; - else if (old_wr_coeff > 1 && bfqq->wr_coeff == 1) - bfqd->wr_busy_queues--; -} - -static int bfqq_process_refs(struct bfq_queue *bfqq) -{ - return bfqq->ref - bfqq->entity.allocated - - bfqq->entity.on_st_or_in_serv - - (bfqq->weight_counter != NULL) - bfqq->stable_ref; -} - -/* Empty burst list and add just bfqq (see comments on bfq_handle_burst) */ -static void bfq_reset_burst_list(struct bfq_data *bfqd, struct bfq_queue *bfqq) -{ - struct bfq_queue *item; - struct hlist_node *n; - - hlist_for_each_entry_safe(item, n, &bfqd->burst_list, burst_list_node) - hlist_del_init(&item->burst_list_node); - - /* - * Start the creation of a new burst list only if there is no - * active queue. See comments on the conditional invocation of - * bfq_handle_burst(). - */ - if (bfq_tot_busy_queues(bfqd) == 0) { - hlist_add_head(&bfqq->burst_list_node, &bfqd->burst_list); - bfqd->burst_size = 1; - } else - bfqd->burst_size = 0; - - bfqd->burst_parent_entity = bfqq->entity.parent; -} - -/* Add bfqq to the list of queues in current burst (see bfq_handle_burst) */ -static void bfq_add_to_burst(struct bfq_data *bfqd, struct bfq_queue *bfqq) -{ - /* Increment burst size to take into account also bfqq */ - bfqd->burst_size++; - - if (bfqd->burst_size == bfqd->bfq_large_burst_thresh) { - struct bfq_queue *pos, *bfqq_item; - struct hlist_node *n; - - /* - * Enough queues have been activated shortly after each - * other to consider this burst as large. - */ - bfqd->large_burst = true; - - /* - * We can now mark all queues in the burst list as - * belonging to a large burst. - */ - hlist_for_each_entry(bfqq_item, &bfqd->burst_list, - burst_list_node) - bfq_mark_bfqq_in_large_burst(bfqq_item); - bfq_mark_bfqq_in_large_burst(bfqq); - - /* - * From now on, and until the current burst finishes, any - * new queue being activated shortly after the last queue - * was inserted in the burst can be immediately marked as - * belonging to a large burst. So the burst list is not - * needed any more. Remove it. - */ - hlist_for_each_entry_safe(pos, n, &bfqd->burst_list, - burst_list_node) - hlist_del_init(&pos->burst_list_node); - } else /* - * Burst not yet large: add bfqq to the burst list. Do - * not increment the ref counter for bfqq, because bfqq - * is removed from the burst list before freeing bfqq - * in put_queue. - */ - hlist_add_head(&bfqq->burst_list_node, &bfqd->burst_list); -} - -/* - * If many queues belonging to the same group happen to be created - * shortly after each other, then the processes associated with these - * queues have typically a common goal. In particular, bursts of queue - * creations are usually caused by services or applications that spawn - * many parallel threads/processes. Examples are systemd during boot, - * or git grep. To help these processes get their job done as soon as - * possible, it is usually better to not grant either weight-raising - * or device idling to their queues, unless these queues must be - * protected from the I/O flowing through other active queues. - * - * In this comment we describe, firstly, the reasons why this fact - * holds, and, secondly, the next function, which implements the main - * steps needed to properly mark these queues so that they can then be - * treated in a different way. - * - * The above services or applications benefit mostly from a high - * throughput: the quicker the requests of the activated queues are - * cumulatively served, the sooner the target job of these queues gets - * completed. As a consequence, weight-raising any of these queues, - * which also implies idling the device for it, is almost always - * counterproductive, unless there are other active queues to isolate - * these new queues from. If there no other active queues, then - * weight-raising these new queues just lowers throughput in most - * cases. - * - * On the other hand, a burst of queue creations may be caused also by - * the start of an application that does not consist of a lot of - * parallel I/O-bound threads. In fact, with a complex application, - * several short processes may need to be executed to start-up the - * application. In this respect, to start an application as quickly as - * possible, the best thing to do is in any case to privilege the I/O - * related to the application with respect to all other - * I/O. Therefore, the best strategy to start as quickly as possible - * an application that causes a burst of queue creations is to - * weight-raise all the queues created during the burst. This is the - * exact opposite of the best strategy for the other type of bursts. - * - * In the end, to take the best action for each of the two cases, the - * two types of bursts need to be distinguished. Fortunately, this - * seems relatively easy, by looking at the sizes of the bursts. In - * particular, we found a threshold such that only bursts with a - * larger size than that threshold are apparently caused by - * services or commands such as systemd or git grep. For brevity, - * hereafter we call just 'large' these bursts. BFQ *does not* - * weight-raise queues whose creation occurs in a large burst. In - * addition, for each of these queues BFQ performs or does not perform - * idling depending on which choice boosts the throughput more. The - * exact choice depends on the device and request pattern at - * hand. - * - * Unfortunately, false positives may occur while an interactive task - * is starting (e.g., an application is being started). The - * consequence is that the queues associated with the task do not - * enjoy weight raising as expected. Fortunately these false positives - * are very rare. They typically occur if some service happens to - * start doing I/O exactly when the interactive task starts. - * - * Turning back to the next function, it is invoked only if there are - * no active queues (apart from active queues that would belong to the - * same, possible burst bfqq would belong to), and it implements all - * the steps needed to detect the occurrence of a large burst and to - * properly mark all the queues belonging to it (so that they can then - * be treated in a different way). This goal is achieved by - * maintaining a "burst list" that holds, temporarily, the queues that - * belong to the burst in progress. The list is then used to mark - * these queues as belonging to a large burst if the burst does become - * large. The main steps are the following. - * - * . when the very first queue is created, the queue is inserted into the - * list (as it could be the first queue in a possible burst) - * - * . if the current burst has not yet become large, and a queue Q that does - * not yet belong to the burst is activated shortly after the last time - * at which a new queue entered the burst list, then the function appends - * Q to the burst list - * - * . if, as a consequence of the previous step, the burst size reaches - * the large-burst threshold, then - * - * . all the queues in the burst list are marked as belonging to a - * large burst - * - * . the burst list is deleted; in fact, the burst list already served - * its purpose (keeping temporarily track of the queues in a burst, - * so as to be able to mark them as belonging to a large burst in the - * previous sub-step), and now is not needed any more - * - * . the device enters a large-burst mode - * - * . if a queue Q that does not belong to the burst is created while - * the device is in large-burst mode and shortly after the last time - * at which a queue either entered the burst list or was marked as - * belonging to the current large burst, then Q is immediately marked - * as belonging to a large burst. - * - * . if a queue Q that does not belong to the burst is created a while - * later, i.e., not shortly after, than the last time at which a queue - * either entered the burst list or was marked as belonging to the - * current large burst, then the current burst is deemed as finished and: - * - * . the large-burst mode is reset if set - * - * . the burst list is emptied - * - * . Q is inserted in the burst list, as Q may be the first queue - * in a possible new burst (then the burst list contains just Q - * after this step). - */ -static void bfq_handle_burst(struct bfq_data *bfqd, struct bfq_queue *bfqq) -{ - /* - * If bfqq is already in the burst list or is part of a large - * burst, or finally has just been split, then there is - * nothing else to do. - */ - if (!hlist_unhashed(&bfqq->burst_list_node) || - bfq_bfqq_in_large_burst(bfqq) || - time_is_after_eq_jiffies(bfqq->split_time + - msecs_to_jiffies(10))) - return; - - /* - * If bfqq's creation happens late enough, or bfqq belongs to - * a different group than the burst group, then the current - * burst is finished, and related data structures must be - * reset. - * - * In this respect, consider the special case where bfqq is - * the very first queue created after BFQ is selected for this - * device. In this case, last_ins_in_burst and - * burst_parent_entity are not yet significant when we get - * here. But it is easy to verify that, whether or not the - * following condition is true, bfqq will end up being - * inserted into the burst list. In particular the list will - * happen to contain only bfqq. And this is exactly what has - * to happen, as bfqq may be the first queue of the first - * burst. - */ - if (time_is_before_jiffies(bfqd->last_ins_in_burst + - bfqd->bfq_burst_interval) || - bfqq->entity.parent != bfqd->burst_parent_entity) { - bfqd->large_burst = false; - bfq_reset_burst_list(bfqd, bfqq); - goto end; - } - - /* - * If we get here, then bfqq is being activated shortly after the - * last queue. So, if the current burst is also large, we can mark - * bfqq as belonging to this large burst immediately. - */ - if (bfqd->large_burst) { - bfq_mark_bfqq_in_large_burst(bfqq); - goto end; - } - - /* - * If we get here, then a large-burst state has not yet been - * reached, but bfqq is being activated shortly after the last - * queue. Then we add bfqq to the burst. - */ - bfq_add_to_burst(bfqd, bfqq); -end: - /* - * At this point, bfqq either has been added to the current - * burst or has caused the current burst to terminate and a - * possible new burst to start. In particular, in the second - * case, bfqq has become the first queue in the possible new - * burst. In both cases last_ins_in_burst needs to be moved - * forward. - */ - bfqd->last_ins_in_burst = jiffies; -} - -static int bfq_bfqq_budget_left(struct bfq_queue *bfqq) -{ - struct bfq_entity *entity = &bfqq->entity; - - return entity->budget - entity->service; -} - -/* - * If enough samples have been computed, return the current max budget - * stored in bfqd, which is dynamically updated according to the - * estimated disk peak rate; otherwise return the default max budget - */ -static int bfq_max_budget(struct bfq_data *bfqd) -{ - if (bfqd->budgets_assigned < bfq_stats_min_budgets) - return bfq_default_max_budget; - else - return bfqd->bfq_max_budget; -} - -/* - * Return min budget, which is a fraction of the current or default - * max budget (trying with 1/32) - */ -static int bfq_min_budget(struct bfq_data *bfqd) -{ - if (bfqd->budgets_assigned < bfq_stats_min_budgets) - return bfq_default_max_budget / 32; - else - return bfqd->bfq_max_budget / 32; -} - -/* - * The next function, invoked after the input queue bfqq switches from - * idle to busy, updates the budget of bfqq. The function also tells - * whether the in-service queue should be expired, by returning - * true. The purpose of expiring the in-service queue is to give bfqq - * the chance to possibly preempt the in-service queue, and the reason - * for preempting the in-service queue is to achieve one of the two - * goals below. - * - * 1. Guarantee to bfqq its reserved bandwidth even if bfqq has - * expired because it has remained idle. In particular, bfqq may have - * expired for one of the following two reasons: - * - * - BFQQE_NO_MORE_REQUESTS bfqq did not enjoy any device idling - * and did not make it to issue a new request before its last - * request was served; - * - * - BFQQE_TOO_IDLE bfqq did enjoy device idling, but did not issue - * a new request before the expiration of the idling-time. - * - * Even if bfqq has expired for one of the above reasons, the process - * associated with the queue may be however issuing requests greedily, - * and thus be sensitive to the bandwidth it receives (bfqq may have - * remained idle for other reasons: CPU high load, bfqq not enjoying - * idling, I/O throttling somewhere in the path from the process to - * the I/O scheduler, ...). But if, after every expiration for one of - * the above two reasons, bfqq has to wait for the service of at least - * one full budget of another queue before being served again, then - * bfqq is likely to get a much lower bandwidth or resource time than - * its reserved ones. To address this issue, two countermeasures need - * to be taken. - * - * First, the budget and the timestamps of bfqq need to be updated in - * a special way on bfqq reactivation: they need to be updated as if - * bfqq did not remain idle and did not expire. In fact, if they are - * computed as if bfqq expired and remained idle until reactivation, - * then the process associated with bfqq is treated as if, instead of - * being greedy, it stopped issuing requests when bfqq remained idle, - * and restarts issuing requests only on this reactivation. In other - * words, the scheduler does not help the process recover the "service - * hole" between bfqq expiration and reactivation. As a consequence, - * the process receives a lower bandwidth than its reserved one. In - * contrast, to recover this hole, the budget must be updated as if - * bfqq was not expired at all before this reactivation, i.e., it must - * be set to the value of the remaining budget when bfqq was - * expired. Along the same line, timestamps need to be assigned the - * value they had the last time bfqq was selected for service, i.e., - * before last expiration. Thus timestamps need to be back-shifted - * with respect to their normal computation (see [1] for more details - * on this tricky aspect). - * - * Secondly, to allow the process to recover the hole, the in-service - * queue must be expired too, to give bfqq the chance to preempt it - * immediately. In fact, if bfqq has to wait for a full budget of the - * in-service queue to be completed, then it may become impossible to - * let the process recover the hole, even if the back-shifted - * timestamps of bfqq are lower than those of the in-service queue. If - * this happens for most or all of the holes, then the process may not - * receive its reserved bandwidth. In this respect, it is worth noting - * that, being the service of outstanding requests unpreemptible, a - * little fraction of the holes may however be unrecoverable, thereby - * causing a little loss of bandwidth. - * - * The last important point is detecting whether bfqq does need this - * bandwidth recovery. In this respect, the next function deems the - * process associated with bfqq greedy, and thus allows it to recover - * the hole, if: 1) the process is waiting for the arrival of a new - * request (which implies that bfqq expired for one of the above two - * reasons), and 2) such a request has arrived soon. The first - * condition is controlled through the flag non_blocking_wait_rq, - * while the second through the flag arrived_in_time. If both - * conditions hold, then the function computes the budget in the - * above-described special way, and signals that the in-service queue - * should be expired. Timestamp back-shifting is done later in - * __bfq_activate_entity. - * - * 2. Reduce latency. Even if timestamps are not backshifted to let - * the process associated with bfqq recover a service hole, bfqq may - * however happen to have, after being (re)activated, a lower finish - * timestamp than the in-service queue. That is, the next budget of - * bfqq may have to be completed before the one of the in-service - * queue. If this is the case, then preempting the in-service queue - * allows this goal to be achieved, apart from the unpreemptible, - * outstanding requests mentioned above. - * - * Unfortunately, regardless of which of the above two goals one wants - * to achieve, service trees need first to be updated to know whether - * the in-service queue must be preempted. To have service trees - * correctly updated, the in-service queue must be expired and - * rescheduled, and bfqq must be scheduled too. This is one of the - * most costly operations (in future versions, the scheduling - * mechanism may be re-designed in such a way to make it possible to - * know whether preemption is needed without needing to update service - * trees). In addition, queue preemptions almost always cause random - * I/O, which may in turn cause loss of throughput. Finally, there may - * even be no in-service queue when the next function is invoked (so, - * no queue to compare timestamps with). Because of these facts, the - * next function adopts the following simple scheme to avoid costly - * operations, too frequent preemptions and too many dependencies on - * the state of the scheduler: it requests the expiration of the - * in-service queue (unconditionally) only for queues that need to - * recover a hole. Then it delegates to other parts of the code the - * responsibility of handling the above case 2. - */ -static bool bfq_bfqq_update_budg_for_activation(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - bool arrived_in_time) -{ - struct bfq_entity *entity = &bfqq->entity; - - /* - * In the next compound condition, we check also whether there - * is some budget left, because otherwise there is no point in - * trying to go on serving bfqq with this same budget: bfqq - * would be expired immediately after being selected for - * service. This would only cause useless overhead. - */ - if (bfq_bfqq_non_blocking_wait_rq(bfqq) && arrived_in_time && - bfq_bfqq_budget_left(bfqq) > 0) { - /* - * We do not clear the flag non_blocking_wait_rq here, as - * the latter is used in bfq_activate_bfqq to signal - * that timestamps need to be back-shifted (and is - * cleared right after). - */ - - /* - * In next assignment we rely on that either - * entity->service or entity->budget are not updated - * on expiration if bfqq is empty (see - * __bfq_bfqq_recalc_budget). Thus both quantities - * remain unchanged after such an expiration, and the - * following statement therefore assigns to - * entity->budget the remaining budget on such an - * expiration. - */ - entity->budget = min_t(unsigned long, - bfq_bfqq_budget_left(bfqq), - bfqq->max_budget); - - /* - * At this point, we have used entity->service to get - * the budget left (needed for updating - * entity->budget). Thus we finally can, and have to, - * reset entity->service. The latter must be reset - * because bfqq would otherwise be charged again for - * the service it has received during its previous - * service slot(s). - */ - entity->service = 0; - - return true; - } - - /* - * We can finally complete expiration, by setting service to 0. - */ - entity->service = 0; - entity->budget = max_t(unsigned long, bfqq->max_budget, - bfq_serv_to_charge(bfqq->next_rq, bfqq)); - bfq_clear_bfqq_non_blocking_wait_rq(bfqq); - return false; -} - -/* - * Return the farthest past time instant according to jiffies - * macros. - */ -static unsigned long bfq_smallest_from_now(void) -{ - return jiffies - MAX_JIFFY_OFFSET; -} - -static void bfq_update_bfqq_wr_on_rq_arrival(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - unsigned int old_wr_coeff, - bool wr_or_deserves_wr, - bool interactive, - bool in_burst, - bool soft_rt) -{ - if (old_wr_coeff == 1 && wr_or_deserves_wr) { - /* start a weight-raising period */ - if (interactive) { - bfqq->service_from_wr = 0; - bfqq->wr_coeff = bfqd->bfq_wr_coeff; - bfqq->wr_cur_max_time = bfq_wr_duration(bfqd); - } else { - /* - * No interactive weight raising in progress - * here: assign minus infinity to - * wr_start_at_switch_to_srt, to make sure - * that, at the end of the soft-real-time - * weight raising periods that is starting - * now, no interactive weight-raising period - * may be wrongly considered as still in - * progress (and thus actually started by - * mistake). - */ - bfqq->wr_start_at_switch_to_srt = - bfq_smallest_from_now(); - bfqq->wr_coeff = bfqd->bfq_wr_coeff * - BFQ_SOFTRT_WEIGHT_FACTOR; - bfqq->wr_cur_max_time = - bfqd->bfq_wr_rt_max_time; - } - - /* - * If needed, further reduce budget to make sure it is - * close to bfqq's backlog, so as to reduce the - * scheduling-error component due to a too large - * budget. Do not care about throughput consequences, - * but only about latency. Finally, do not assign a - * too small budget either, to avoid increasing - * latency by causing too frequent expirations. - */ - bfqq->entity.budget = min_t(unsigned long, - bfqq->entity.budget, - 2 * bfq_min_budget(bfqd)); - } else if (old_wr_coeff > 1) { - if (interactive) { /* update wr coeff and duration */ - bfqq->wr_coeff = bfqd->bfq_wr_coeff; - bfqq->wr_cur_max_time = bfq_wr_duration(bfqd); - } else if (in_burst) - bfqq->wr_coeff = 1; - else if (soft_rt) { - /* - * The application is now or still meeting the - * requirements for being deemed soft rt. We - * can then correctly and safely (re)charge - * the weight-raising duration for the - * application with the weight-raising - * duration for soft rt applications. - * - * In particular, doing this recharge now, i.e., - * before the weight-raising period for the - * application finishes, reduces the probability - * of the following negative scenario: - * 1) the weight of a soft rt application is - * raised at startup (as for any newly - * created application), - * 2) since the application is not interactive, - * at a certain time weight-raising is - * stopped for the application, - * 3) at that time the application happens to - * still have pending requests, and hence - * is destined to not have a chance to be - * deemed soft rt before these requests are - * completed (see the comments to the - * function bfq_bfqq_softrt_next_start() - * for details on soft rt detection), - * 4) these pending requests experience a high - * latency because the application is not - * weight-raised while they are pending. - */ - if (bfqq->wr_cur_max_time != - bfqd->bfq_wr_rt_max_time) { - bfqq->wr_start_at_switch_to_srt = - bfqq->last_wr_start_finish; - - bfqq->wr_cur_max_time = - bfqd->bfq_wr_rt_max_time; - bfqq->wr_coeff = bfqd->bfq_wr_coeff * - BFQ_SOFTRT_WEIGHT_FACTOR; - } - bfqq->last_wr_start_finish = jiffies; - } - } -} - -static bool bfq_bfqq_idle_for_long_time(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - return bfqq->dispatched == 0 && - time_is_before_jiffies( - bfqq->budget_timeout + - bfqd->bfq_wr_min_idle_time); -} - - -/* - * Return true if bfqq is in a higher priority class, or has a higher - * weight than the in-service queue. - */ -static bool bfq_bfqq_higher_class_or_weight(struct bfq_queue *bfqq, - struct bfq_queue *in_serv_bfqq) -{ - int bfqq_weight, in_serv_weight; - - if (bfqq->ioprio_class < in_serv_bfqq->ioprio_class) - return true; - - if (in_serv_bfqq->entity.parent == bfqq->entity.parent) { - bfqq_weight = bfqq->entity.weight; - in_serv_weight = in_serv_bfqq->entity.weight; - } else { - if (bfqq->entity.parent) - bfqq_weight = bfqq->entity.parent->weight; - else - bfqq_weight = bfqq->entity.weight; - if (in_serv_bfqq->entity.parent) - in_serv_weight = in_serv_bfqq->entity.parent->weight; - else - in_serv_weight = in_serv_bfqq->entity.weight; - } - - return bfqq_weight > in_serv_weight; -} - -/* - * Get the index of the actuator that will serve bio. - */ -static unsigned int bfq_actuator_index(struct bfq_data *bfqd, struct bio *bio) -{ - unsigned int i; - sector_t end; - - /* no search needed if one or zero ranges present */ - if (bfqd->num_actuators == 1) - return 0; - - /* bio_end_sector(bio) gives the sector after the last one */ - end = bio_end_sector(bio) - 1; - - for (i = 0; i < bfqd->num_actuators; i++) { - if (end >= bfqd->sector[i] && - end < bfqd->sector[i] + bfqd->nr_sectors[i]) - return i; - } - - WARN_ONCE(true, - "bfq_actuator_index: bio sector out of ranges: end=%llu\n", - end); - return 0; -} - -static bool bfq_better_to_idle(struct bfq_queue *bfqq); - -static void bfq_bfqq_handle_idle_busy_switch(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - int old_wr_coeff, - struct request *rq, - bool *interactive) -{ - bool soft_rt, in_burst, wr_or_deserves_wr, - bfqq_wants_to_preempt, - idle_for_long_time = bfq_bfqq_idle_for_long_time(bfqd, bfqq), - /* - * See the comments on - * bfq_bfqq_update_budg_for_activation for - * details on the usage of the next variable. - */ - arrived_in_time = blk_time_get_ns() <= - bfqq->ttime.last_end_request + - bfqd->bfq_slice_idle * 3; - unsigned int act_idx = bfq_actuator_index(bfqd, rq->bio); - bool bfqq_non_merged_or_stably_merged = - bfqq->bic || RQ_BIC(rq)->bfqq_data[act_idx].stably_merged; - - /* - * bfqq deserves to be weight-raised if: - * - it is sync, - * - it does not belong to a large burst, - * - it has been idle for enough time or is soft real-time, - * - is linked to a bfq_io_cq (it is not shared in any sense), - * - has a default weight (otherwise we assume the user wanted - * to control its weight explicitly) - */ - in_burst = bfq_bfqq_in_large_burst(bfqq); - soft_rt = bfqd->bfq_wr_max_softrt_rate > 0 && - !BFQQ_TOTALLY_SEEKY(bfqq) && - !in_burst && - time_is_before_jiffies(bfqq->soft_rt_next_start) && - bfqq->dispatched == 0 && - bfqq->entity.new_weight == 40; - *interactive = !in_burst && idle_for_long_time && - bfqq->entity.new_weight == 40; - /* - * Merged bfq_queues are kept out of weight-raising - * (low-latency) mechanisms. The reason is that these queues - * are usually created for non-interactive and - * non-soft-real-time tasks. Yet this is not the case for - * stably-merged queues. These queues are merged just because - * they are created shortly after each other. So they may - * easily serve the I/O of an interactive or soft-real time - * application, if the application happens to spawn multiple - * processes. So let also stably-merged queued enjoy weight - * raising. - */ - wr_or_deserves_wr = bfqd->low_latency && - (bfqq->wr_coeff > 1 || - (bfq_bfqq_sync(bfqq) && bfqq_non_merged_or_stably_merged && - (*interactive || soft_rt))); - - /* - * Using the last flag, update budget and check whether bfqq - * may want to preempt the in-service queue. - */ - bfqq_wants_to_preempt = - bfq_bfqq_update_budg_for_activation(bfqd, bfqq, - arrived_in_time); - - /* - * If bfqq happened to be activated in a burst, but has been - * idle for much more than an interactive queue, then we - * assume that, in the overall I/O initiated in the burst, the - * I/O associated with bfqq is finished. So bfqq does not need - * to be treated as a queue belonging to a burst - * anymore. Accordingly, we reset bfqq's in_large_burst flag - * if set, and remove bfqq from the burst list if it's - * there. We do not decrement burst_size, because the fact - * that bfqq does not need to belong to the burst list any - * more does not invalidate the fact that bfqq was created in - * a burst. - */ - if (likely(!bfq_bfqq_just_created(bfqq)) && - idle_for_long_time && - time_is_before_jiffies( - bfqq->budget_timeout + - msecs_to_jiffies(10000))) { - hlist_del_init(&bfqq->burst_list_node); - bfq_clear_bfqq_in_large_burst(bfqq); - } - - bfq_clear_bfqq_just_created(bfqq); - - if (bfqd->low_latency) { - if (unlikely(time_is_after_jiffies(bfqq->split_time))) - /* wraparound */ - bfqq->split_time = - jiffies - bfqd->bfq_wr_min_idle_time - 1; - - if (time_is_before_jiffies(bfqq->split_time + - bfqd->bfq_wr_min_idle_time)) { - bfq_update_bfqq_wr_on_rq_arrival(bfqd, bfqq, - old_wr_coeff, - wr_or_deserves_wr, - *interactive, - in_burst, - soft_rt); - - if (old_wr_coeff != bfqq->wr_coeff) - bfqq->entity.prio_changed = 1; - } - } - - bfqq->last_idle_bklogged = jiffies; - bfqq->service_from_backlogged = 0; - bfq_clear_bfqq_softrt_update(bfqq); - - bfq_add_bfqq_busy(bfqq); - - /* - * Expire in-service queue if preemption may be needed for - * guarantees or throughput. As for guarantees, we care - * explicitly about two cases. The first is that bfqq has to - * recover a service hole, as explained in the comments on - * bfq_bfqq_update_budg_for_activation(), i.e., that - * bfqq_wants_to_preempt is true. However, if bfqq does not - * carry time-critical I/O, then bfqq's bandwidth is less - * important than that of queues that carry time-critical I/O. - * So, as a further constraint, we consider this case only if - * bfqq is at least as weight-raised, i.e., at least as time - * critical, as the in-service queue. - * - * The second case is that bfqq is in a higher priority class, - * or has a higher weight than the in-service queue. If this - * condition does not hold, we don't care because, even if - * bfqq does not start to be served immediately, the resulting - * delay for bfqq's I/O is however lower or much lower than - * the ideal completion time to be guaranteed to bfqq's I/O. - * - * In both cases, preemption is needed only if, according to - * the timestamps of both bfqq and of the in-service queue, - * bfqq actually is the next queue to serve. So, to reduce - * useless preemptions, the return value of - * next_queue_may_preempt() is considered in the next compound - * condition too. Yet next_queue_may_preempt() just checks a - * simple, necessary condition for bfqq to be the next queue - * to serve. In fact, to evaluate a sufficient condition, the - * timestamps of the in-service queue would need to be - * updated, and this operation is quite costly (see the - * comments on bfq_bfqq_update_budg_for_activation()). - * - * As for throughput, we ask bfq_better_to_idle() whether we - * still need to plug I/O dispatching. If bfq_better_to_idle() - * says no, then plugging is not needed any longer, either to - * boost throughput or to perserve service guarantees. Then - * the best option is to stop plugging I/O, as not doing so - * would certainly lower throughput. We may end up in this - * case if: (1) upon a dispatch attempt, we detected that it - * was better to plug I/O dispatch, and to wait for a new - * request to arrive for the currently in-service queue, but - * (2) this switch of bfqq to busy changes the scenario. - */ - if (bfqd->in_service_queue && - ((bfqq_wants_to_preempt && - bfqq->wr_coeff >= bfqd->in_service_queue->wr_coeff) || - bfq_bfqq_higher_class_or_weight(bfqq, bfqd->in_service_queue) || - !bfq_better_to_idle(bfqd->in_service_queue)) && - next_queue_may_preempt(bfqd)) - bfq_bfqq_expire(bfqd, bfqd->in_service_queue, - false, BFQQE_PREEMPTED); -} - -static void bfq_reset_inject_limit(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - /* invalidate baseline total service time */ - bfqq->last_serv_time_ns = 0; - - /* - * Reset pointer in case we are waiting for - * some request completion. - */ - bfqd->waited_rq = NULL; - - /* - * If bfqq has a short think time, then start by setting the - * inject limit to 0 prudentially, because the service time of - * an injected I/O request may be higher than the think time - * of bfqq, and therefore, if one request was injected when - * bfqq remains empty, this injected request might delay the - * service of the next I/O request for bfqq significantly. In - * case bfqq can actually tolerate some injection, then the - * adaptive update will however raise the limit soon. This - * lucky circumstance holds exactly because bfqq has a short - * think time, and thus, after remaining empty, is likely to - * get new I/O enqueued---and then completed---before being - * expired. This is the very pattern that gives the - * limit-update algorithm the chance to measure the effect of - * injection on request service times, and then to update the - * limit accordingly. - * - * However, in the following special case, the inject limit is - * left to 1 even if the think time is short: bfqq's I/O is - * synchronized with that of some other queue, i.e., bfqq may - * receive new I/O only after the I/O of the other queue is - * completed. Keeping the inject limit to 1 allows the - * blocking I/O to be served while bfqq is in service. And - * this is very convenient both for bfqq and for overall - * throughput, as explained in detail in the comments in - * bfq_update_has_short_ttime(). - * - * On the opposite end, if bfqq has a long think time, then - * start directly by 1, because: - * a) on the bright side, keeping at most one request in - * service in the drive is unlikely to cause any harm to the - * latency of bfqq's requests, as the service time of a single - * request is likely to be lower than the think time of bfqq; - * b) on the downside, after becoming empty, bfqq is likely to - * expire before getting its next request. With this request - * arrival pattern, it is very hard to sample total service - * times and update the inject limit accordingly (see comments - * on bfq_update_inject_limit()). So the limit is likely to be - * never, or at least seldom, updated. As a consequence, by - * setting the limit to 1, we avoid that no injection ever - * occurs with bfqq. On the downside, this proactive step - * further reduces chances to actually compute the baseline - * total service time. Thus it reduces chances to execute the - * limit-update algorithm and possibly raise the limit to more - * than 1. - */ - if (bfq_bfqq_has_short_ttime(bfqq)) - bfqq->inject_limit = 0; - else - bfqq->inject_limit = 1; - - bfqq->decrease_time_jif = jiffies; -} - -static void bfq_update_io_intensity(struct bfq_queue *bfqq, u64 now_ns) -{ - u64 tot_io_time = now_ns - bfqq->io_start_time; - - if (RB_EMPTY_ROOT(&bfqq->sort_list) && bfqq->dispatched == 0) - bfqq->tot_idle_time += - now_ns - bfqq->ttime.last_end_request; - - if (unlikely(bfq_bfqq_just_created(bfqq))) - return; - - /* - * Must be busy for at least about 80% of the time to be - * considered I/O bound. - */ - if (bfqq->tot_idle_time * 5 > tot_io_time) - bfq_clear_bfqq_IO_bound(bfqq); - else - bfq_mark_bfqq_IO_bound(bfqq); - - /* - * Keep an observation window of at most 200 ms in the past - * from now. - */ - if (tot_io_time > 200 * NSEC_PER_MSEC) { - bfqq->io_start_time = now_ns - (tot_io_time>>1); - bfqq->tot_idle_time >>= 1; - } -} - -/* - * Detect whether bfqq's I/O seems synchronized with that of some - * other queue, i.e., whether bfqq, after remaining empty, happens to - * receive new I/O only right after some I/O request of the other - * queue has been completed. We call waker queue the other queue, and - * we assume, for simplicity, that bfqq may have at most one waker - * queue. - * - * A remarkable throughput boost can be reached by unconditionally - * injecting the I/O of the waker queue, every time a new - * bfq_dispatch_request happens to be invoked while I/O is being - * plugged for bfqq. In addition to boosting throughput, this - * unblocks bfqq's I/O, thereby improving bandwidth and latency for - * bfqq. Note that these same results may be achieved with the general - * injection mechanism, but less effectively. For details on this - * aspect, see the comments on the choice of the queue for injection - * in bfq_select_queue(). - * - * Turning back to the detection of a waker queue, a queue Q is deemed as a - * waker queue for bfqq if, for three consecutive times, bfqq happens to become - * non empty right after a request of Q has been completed within given - * timeout. In this respect, even if bfqq is empty, we do not check for a waker - * if it still has some in-flight I/O. In fact, in this case bfqq is actually - * still being served by the drive, and may receive new I/O on the completion - * of some of the in-flight requests. In particular, on the first time, Q is - * tentatively set as a candidate waker queue, while on the third consecutive - * time that Q is detected, the field waker_bfqq is set to Q, to confirm that Q - * is a waker queue for bfqq. These detection steps are performed only if bfqq - * has a long think time, so as to make it more likely that bfqq's I/O is - * actually being blocked by a synchronization. This last filter, plus the - * above three-times requirement and time limit for detection, make false - * positives less likely. - * - * NOTE - * - * The sooner a waker queue is detected, the sooner throughput can be - * boosted by injecting I/O from the waker queue. Fortunately, - * detection is likely to be actually fast, for the following - * reasons. While blocked by synchronization, bfqq has a long think - * time. This implies that bfqq's inject limit is at least equal to 1 - * (see the comments in bfq_update_inject_limit()). So, thanks to - * injection, the waker queue is likely to be served during the very - * first I/O-plugging time interval for bfqq. This triggers the first - * step of the detection mechanism. Thanks again to injection, the - * candidate waker queue is then likely to be confirmed no later than - * during the next I/O-plugging interval for bfqq. - * - * ISSUE - * - * On queue merging all waker information is lost. - */ -static void bfq_check_waker(struct bfq_data *bfqd, struct bfq_queue *bfqq, - u64 now_ns) -{ - char waker_name[MAX_BFQQ_NAME_LENGTH]; - - if (!bfqd->last_completed_rq_bfqq || - bfqd->last_completed_rq_bfqq == bfqq || - bfq_bfqq_has_short_ttime(bfqq) || - now_ns - bfqd->last_completion >= 4 * NSEC_PER_MSEC || - bfqd->last_completed_rq_bfqq == &bfqd->oom_bfqq || - bfqq == &bfqd->oom_bfqq) - return; - - /* - * We reset waker detection logic also if too much time has passed - * since the first detection. If wakeups are rare, pointless idling - * doesn't hurt throughput that much. The condition below makes sure - * we do not uselessly idle blocking waker in more than 1/64 cases. - */ - if (bfqd->last_completed_rq_bfqq != - bfqq->tentative_waker_bfqq || - now_ns > bfqq->waker_detection_started + - 128 * (u64)bfqd->bfq_slice_idle) { - /* - * First synchronization detected with a - * candidate waker queue, or with a different - * candidate waker queue from the current one. - */ - bfqq->tentative_waker_bfqq = - bfqd->last_completed_rq_bfqq; - bfqq->num_waker_detections = 1; - bfqq->waker_detection_started = now_ns; - bfq_bfqq_name(bfqq->tentative_waker_bfqq, waker_name, - MAX_BFQQ_NAME_LENGTH); - bfq_log_bfqq(bfqd, bfqq, "set tentative waker %s", waker_name); - } else /* Same tentative waker queue detected again */ - bfqq->num_waker_detections++; - - if (bfqq->num_waker_detections == 3) { - bfqq->waker_bfqq = bfqd->last_completed_rq_bfqq; - bfqq->tentative_waker_bfqq = NULL; - bfq_bfqq_name(bfqq->waker_bfqq, waker_name, - MAX_BFQQ_NAME_LENGTH); - bfq_log_bfqq(bfqd, bfqq, "set waker %s", waker_name); - - /* - * If the waker queue disappears, then - * bfqq->waker_bfqq must be reset. To - * this goal, we maintain in each - * waker queue a list, woken_list, of - * all the queues that reference the - * waker queue through their - * waker_bfqq pointer. When the waker - * queue exits, the waker_bfqq pointer - * of all the queues in the woken_list - * is reset. - * - * In addition, if bfqq is already in - * the woken_list of a waker queue, - * then, before being inserted into - * the woken_list of a new waker - * queue, bfqq must be removed from - * the woken_list of the old waker - * queue. - */ - if (!hlist_unhashed(&bfqq->woken_list_node)) - hlist_del_init(&bfqq->woken_list_node); - hlist_add_head(&bfqq->woken_list_node, - &bfqd->last_completed_rq_bfqq->woken_list); - } -} - -static void bfq_add_request(struct request *rq) -{ - struct bfq_queue *bfqq = RQ_BFQQ(rq); - struct bfq_data *bfqd = bfqq->bfqd; - struct request *next_rq, *prev; - unsigned int old_wr_coeff = bfqq->wr_coeff; - bool interactive = false; - u64 now_ns = blk_time_get_ns(); - - bfq_log_bfqq(bfqd, bfqq, "add_request %d", rq_is_sync(rq)); - bfqq->queued[rq_is_sync(rq)]++; - /* - * Updating of 'bfqd->queued' is protected by 'bfqd->lock', however, it - * may be read without holding the lock in bfq_has_work(). - */ - WRITE_ONCE(bfqd->queued, bfqd->queued + 1); - - if (bfq_bfqq_sync(bfqq) && RQ_BIC(rq)->requests <= 1) { - bfq_check_waker(bfqd, bfqq, now_ns); - - /* - * Periodically reset inject limit, to make sure that - * the latter eventually drops in case workload - * changes, see step (3) in the comments on - * bfq_update_inject_limit(). - */ - if (time_is_before_eq_jiffies(bfqq->decrease_time_jif + - msecs_to_jiffies(1000))) - bfq_reset_inject_limit(bfqd, bfqq); - - /* - * The following conditions must hold to setup a new - * sampling of total service time, and then a new - * update of the inject limit: - * - bfqq is in service, because the total service - * time is evaluated only for the I/O requests of - * the queues in service; - * - this is the right occasion to compute or to - * lower the baseline total service time, because - * there are actually no requests in the drive, - * or - * the baseline total service time is available, and - * this is the right occasion to compute the other - * quantity needed to update the inject limit, i.e., - * the total service time caused by the amount of - * injection allowed by the current value of the - * limit. It is the right occasion because injection - * has actually been performed during the service - * hole, and there are still in-flight requests, - * which are very likely to be exactly the injected - * requests, or part of them; - * - the minimum interval for sampling the total - * service time and updating the inject limit has - * elapsed. - */ - if (bfqq == bfqd->in_service_queue && - (bfqd->tot_rq_in_driver == 0 || - (bfqq->last_serv_time_ns > 0 && - bfqd->rqs_injected && bfqd->tot_rq_in_driver > 0)) && - time_is_before_eq_jiffies(bfqq->decrease_time_jif + - msecs_to_jiffies(10))) { - bfqd->last_empty_occupied_ns = blk_time_get_ns(); - /* - * Start the state machine for measuring the - * total service time of rq: setting - * wait_dispatch will cause bfqd->waited_rq to - * be set when rq will be dispatched. - */ - bfqd->wait_dispatch = true; - /* - * If there is no I/O in service in the drive, - * then possible injection occurred before the - * arrival of rq will not affect the total - * service time of rq. So the injection limit - * must not be updated as a function of such - * total service time, unless new injection - * occurs before rq is completed. To have the - * injection limit updated only in the latter - * case, reset rqs_injected here (rqs_injected - * will be set in case injection is performed - * on bfqq before rq is completed). - */ - if (bfqd->tot_rq_in_driver == 0) - bfqd->rqs_injected = false; - } - } - - if (bfq_bfqq_sync(bfqq)) - bfq_update_io_intensity(bfqq, now_ns); - - elv_rb_add(&bfqq->sort_list, rq); - - /* - * Check if this request is a better next-serve candidate. - */ - prev = bfqq->next_rq; - next_rq = bfq_choose_req(bfqd, bfqq->next_rq, rq, bfqd->last_position); - bfqq->next_rq = next_rq; - - /* - * Adjust priority tree position, if next_rq changes. - * See comments on bfq_pos_tree_add_move() for the unlikely(). - */ - if (unlikely(!bfqd->nonrot_with_queueing && prev != bfqq->next_rq)) - bfq_pos_tree_add_move(bfqd, bfqq); - - if (!bfq_bfqq_busy(bfqq)) /* switching to busy ... */ - bfq_bfqq_handle_idle_busy_switch(bfqd, bfqq, old_wr_coeff, - rq, &interactive); - else { - if (bfqd->low_latency && old_wr_coeff == 1 && !rq_is_sync(rq) && - time_is_before_jiffies( - bfqq->last_wr_start_finish + - bfqd->bfq_wr_min_inter_arr_async)) { - bfqq->wr_coeff = bfqd->bfq_wr_coeff; - bfqq->wr_cur_max_time = bfq_wr_duration(bfqd); - - bfqd->wr_busy_queues++; - bfqq->entity.prio_changed = 1; - } - if (prev != bfqq->next_rq) - bfq_updated_next_req(bfqd, bfqq); - } - - /* - * Assign jiffies to last_wr_start_finish in the following - * cases: - * - * . if bfqq is not going to be weight-raised, because, for - * non weight-raised queues, last_wr_start_finish stores the - * arrival time of the last request; as of now, this piece - * of information is used only for deciding whether to - * weight-raise async queues - * - * . if bfqq is not weight-raised, because, if bfqq is now - * switching to weight-raised, then last_wr_start_finish - * stores the time when weight-raising starts - * - * . if bfqq is interactive, because, regardless of whether - * bfqq is currently weight-raised, the weight-raising - * period must start or restart (this case is considered - * separately because it is not detected by the above - * conditions, if bfqq is already weight-raised) - * - * last_wr_start_finish has to be updated also if bfqq is soft - * real-time, because the weight-raising period is constantly - * restarted on idle-to-busy transitions for these queues, but - * this is already done in bfq_bfqq_handle_idle_busy_switch if - * needed. - */ - if (bfqd->low_latency && - (old_wr_coeff == 1 || bfqq->wr_coeff == 1 || interactive)) - bfqq->last_wr_start_finish = jiffies; -} - -static struct request *bfq_find_rq_fmerge(struct bfq_data *bfqd, - struct bio *bio, - struct request_queue *q) -{ - struct bfq_queue *bfqq = bfqd->bio_bfqq; - - - if (bfqq) - return elv_rb_find(&bfqq->sort_list, bio_end_sector(bio)); - - return NULL; -} - -static sector_t get_sdist(sector_t last_pos, struct request *rq) -{ - if (last_pos) - return abs(blk_rq_pos(rq) - last_pos); - - return 0; -} - -static void bfq_remove_request(struct request_queue *q, - struct request *rq) -{ - struct bfq_queue *bfqq = RQ_BFQQ(rq); - struct bfq_data *bfqd = bfqq->bfqd; - const int sync = rq_is_sync(rq); - - if (bfqq->next_rq == rq) { - bfqq->next_rq = bfq_find_next_rq(bfqd, bfqq, rq); - bfq_updated_next_req(bfqd, bfqq); - } - - if (rq->queuelist.prev != &rq->queuelist) - list_del_init(&rq->queuelist); - bfqq->queued[sync]--; - /* - * Updating of 'bfqd->queued' is protected by 'bfqd->lock', however, it - * may be read without holding the lock in bfq_has_work(). - */ - WRITE_ONCE(bfqd->queued, bfqd->queued - 1); - elv_rb_del(&bfqq->sort_list, rq); - - elv_rqhash_del(q, rq); - if (q->last_merge == rq) - q->last_merge = NULL; - - if (RB_EMPTY_ROOT(&bfqq->sort_list)) { - bfqq->next_rq = NULL; - - if (bfq_bfqq_busy(bfqq) && bfqq != bfqd->in_service_queue) { - bfq_del_bfqq_busy(bfqq, false); - /* - * bfqq emptied. In normal operation, when - * bfqq is empty, bfqq->entity.service and - * bfqq->entity.budget must contain, - * respectively, the service received and the - * budget used last time bfqq emptied. These - * facts do not hold in this case, as at least - * this last removal occurred while bfqq is - * not in service. To avoid inconsistencies, - * reset both bfqq->entity.service and - * bfqq->entity.budget, if bfqq has still a - * process that may issue I/O requests to it. - */ - bfqq->entity.budget = bfqq->entity.service = 0; - } - - /* - * Remove queue from request-position tree as it is empty. - */ - if (bfqq->pos_root) { - rb_erase(&bfqq->pos_node, bfqq->pos_root); - bfqq->pos_root = NULL; - } - } else { - /* see comments on bfq_pos_tree_add_move() for the unlikely() */ - if (unlikely(!bfqd->nonrot_with_queueing)) - bfq_pos_tree_add_move(bfqd, bfqq); - } - - if (rq->cmd_flags & REQ_META) - bfqq->meta_pending--; - -} - -static bool bfq_bio_merge(struct request_queue *q, struct bio *bio, - unsigned int nr_segs) -{ - struct bfq_data *bfqd = q->elevator->elevator_data; - struct request *free = NULL; - /* - * bfq_bic_lookup grabs the queue_lock: invoke it now and - * store its return value for later use, to avoid nesting - * queue_lock inside the bfqd->lock. We assume that the bic - * returned by bfq_bic_lookup does not go away before - * bfqd->lock is taken. - */ - struct bfq_io_cq *bic = bfq_bic_lookup(q); - bool ret; - - spin_lock_irq(&bfqd->lock); - - if (bic) { - /* - * Make sure cgroup info is uptodate for current process before - * considering the merge. - */ - bfq_bic_update_cgroup(bic, bio); - - bfqd->bio_bfqq = bic_to_bfqq(bic, op_is_sync(bio->bi_opf), - bfq_actuator_index(bfqd, bio)); - } else { - bfqd->bio_bfqq = NULL; - } - bfqd->bio_bic = bic; - - ret = blk_mq_sched_try_merge(q, bio, nr_segs, &free); - - spin_unlock_irq(&bfqd->lock); - if (free) - blk_mq_free_request(free); - - return ret; -} - -static int bfq_request_merge(struct request_queue *q, struct request **req, - struct bio *bio) -{ - struct bfq_data *bfqd = q->elevator->elevator_data; - struct request *__rq; - - __rq = bfq_find_rq_fmerge(bfqd, bio, q); - if (__rq && elv_bio_merge_ok(__rq, bio)) { - *req = __rq; - - if (blk_discard_mergable(__rq)) - return ELEVATOR_DISCARD_MERGE; - return ELEVATOR_FRONT_MERGE; - } - - return ELEVATOR_NO_MERGE; -} - -static void bfq_request_merged(struct request_queue *q, struct request *req, - enum elv_merge type) -{ - if (type == ELEVATOR_FRONT_MERGE && - rb_prev(&req->rb_node) && - blk_rq_pos(req) < - blk_rq_pos(container_of(rb_prev(&req->rb_node), - struct request, rb_node))) { - struct bfq_queue *bfqq = RQ_BFQQ(req); - struct bfq_data *bfqd; - struct request *prev, *next_rq; - - if (!bfqq) - return; - - bfqd = bfqq->bfqd; - - /* Reposition request in its sort_list */ - elv_rb_del(&bfqq->sort_list, req); - elv_rb_add(&bfqq->sort_list, req); - - /* Choose next request to be served for bfqq */ - prev = bfqq->next_rq; - next_rq = bfq_choose_req(bfqd, bfqq->next_rq, req, - bfqd->last_position); - bfqq->next_rq = next_rq; - /* - * If next_rq changes, update both the queue's budget to - * fit the new request and the queue's position in its - * rq_pos_tree. - */ - if (prev != bfqq->next_rq) { - bfq_updated_next_req(bfqd, bfqq); - /* - * See comments on bfq_pos_tree_add_move() for - * the unlikely(). - */ - if (unlikely(!bfqd->nonrot_with_queueing)) - bfq_pos_tree_add_move(bfqd, bfqq); - } - } -} - -/* - * This function is called to notify the scheduler that the requests - * rq and 'next' have been merged, with 'next' going away. BFQ - * exploits this hook to address the following issue: if 'next' has a - * fifo_time lower that rq, then the fifo_time of rq must be set to - * the value of 'next', to not forget the greater age of 'next'. - * - * NOTE: in this function we assume that rq is in a bfq_queue, basing - * on that rq is picked from the hash table q->elevator->hash, which, - * in its turn, is filled only with I/O requests present in - * bfq_queues, while BFQ is in use for the request queue q. In fact, - * the function that fills this hash table (elv_rqhash_add) is called - * only by bfq_insert_request. - */ -static void bfq_requests_merged(struct request_queue *q, struct request *rq, - struct request *next) -{ - struct bfq_queue *bfqq = RQ_BFQQ(rq), - *next_bfqq = RQ_BFQQ(next); - - if (!bfqq) - goto remove; - - /* - * If next and rq belong to the same bfq_queue and next is older - * than rq, then reposition rq in the fifo (by substituting next - * with rq). Otherwise, if next and rq belong to different - * bfq_queues, never reposition rq: in fact, we would have to - * reposition it with respect to next's position in its own fifo, - * which would most certainly be too expensive with respect to - * the benefits. - */ - if (bfqq == next_bfqq && - !list_empty(&rq->queuelist) && !list_empty(&next->queuelist) && - next->fifo_time < rq->fifo_time) { - list_del_init(&rq->queuelist); - list_replace_init(&next->queuelist, &rq->queuelist); - rq->fifo_time = next->fifo_time; - } - - if (bfqq->next_rq == next) - bfqq->next_rq = rq; - - bfqg_stats_update_io_merged(bfqq_group(bfqq), next->cmd_flags); -remove: - /* Merged request may be in the IO scheduler. Remove it. */ - if (!RB_EMPTY_NODE(&next->rb_node)) { - bfq_remove_request(next->q, next); - if (next_bfqq) - bfqg_stats_update_io_remove(bfqq_group(next_bfqq), - next->cmd_flags); - } -} - -/* Must be called with bfqq != NULL */ -static void bfq_bfqq_end_wr(struct bfq_queue *bfqq) -{ - /* - * If bfqq has been enjoying interactive weight-raising, then - * reset soft_rt_next_start. We do it for the following - * reason. bfqq may have been conveying the I/O needed to load - * a soft real-time application. Such an application actually - * exhibits a soft real-time I/O pattern after it finishes - * loading, and finally starts doing its job. But, if bfqq has - * been receiving a lot of bandwidth so far (likely to happen - * on a fast device), then soft_rt_next_start now contains a - * high value that. So, without this reset, bfqq would be - * prevented from being possibly considered as soft_rt for a - * very long time. - */ - - if (bfqq->wr_cur_max_time != - bfqq->bfqd->bfq_wr_rt_max_time) - bfqq->soft_rt_next_start = jiffies; - - if (bfq_bfqq_busy(bfqq)) - bfqq->bfqd->wr_busy_queues--; - bfqq->wr_coeff = 1; - bfqq->wr_cur_max_time = 0; - bfqq->last_wr_start_finish = jiffies; - /* - * Trigger a weight change on the next invocation of - * __bfq_entity_update_weight_prio. - */ - bfqq->entity.prio_changed = 1; -} - -void bfq_end_wr_async_queues(struct bfq_data *bfqd, - struct bfq_group *bfqg) -{ - int i, j, k; - - for (k = 0; k < bfqd->num_actuators; k++) { - for (i = 0; i < 2; i++) - for (j = 0; j < IOPRIO_NR_LEVELS; j++) - if (bfqg->async_bfqq[i][j][k]) - bfq_bfqq_end_wr(bfqg->async_bfqq[i][j][k]); - if (bfqg->async_idle_bfqq[k]) - bfq_bfqq_end_wr(bfqg->async_idle_bfqq[k]); - } -} - -static void bfq_end_wr(struct bfq_data *bfqd) -{ - struct bfq_queue *bfqq; - int i; - - spin_lock_irq(&bfqd->lock); - - for (i = 0; i < bfqd->num_actuators; i++) { - list_for_each_entry(bfqq, &bfqd->active_list[i], bfqq_list) - bfq_bfqq_end_wr(bfqq); - } - list_for_each_entry(bfqq, &bfqd->idle_list, bfqq_list) - bfq_bfqq_end_wr(bfqq); - bfq_end_wr_async(bfqd); - - spin_unlock_irq(&bfqd->lock); -} - -static sector_t bfq_io_struct_pos(void *io_struct, bool request) -{ - if (request) - return blk_rq_pos(io_struct); - else - return ((struct bio *)io_struct)->bi_iter.bi_sector; -} - -static int bfq_rq_close_to_sector(void *io_struct, bool request, - sector_t sector) -{ - return abs(bfq_io_struct_pos(io_struct, request) - sector) <= - BFQQ_CLOSE_THR; -} - -static struct bfq_queue *bfqq_find_close(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - sector_t sector) -{ - struct rb_root *root = &bfqq_group(bfqq)->rq_pos_tree; - struct rb_node *parent, *node; - struct bfq_queue *__bfqq; - - if (RB_EMPTY_ROOT(root)) - return NULL; - - /* - * First, if we find a request starting at the end of the last - * request, choose it. - */ - __bfqq = bfq_rq_pos_tree_lookup(bfqd, root, sector, &parent, NULL); - if (__bfqq) - return __bfqq; - - /* - * If the exact sector wasn't found, the parent of the NULL leaf - * will contain the closest sector (rq_pos_tree sorted by - * next_request position). - */ - __bfqq = rb_entry(parent, struct bfq_queue, pos_node); - if (bfq_rq_close_to_sector(__bfqq->next_rq, true, sector)) - return __bfqq; - - if (blk_rq_pos(__bfqq->next_rq) < sector) - node = rb_next(&__bfqq->pos_node); - else - node = rb_prev(&__bfqq->pos_node); - if (!node) - return NULL; - - __bfqq = rb_entry(node, struct bfq_queue, pos_node); - if (bfq_rq_close_to_sector(__bfqq->next_rq, true, sector)) - return __bfqq; - - return NULL; -} - -static struct bfq_queue *bfq_find_close_cooperator(struct bfq_data *bfqd, - struct bfq_queue *cur_bfqq, - sector_t sector) -{ - struct bfq_queue *bfqq; - - /* - * We shall notice if some of the queues are cooperating, - * e.g., working closely on the same area of the device. In - * that case, we can group them together and: 1) don't waste - * time idling, and 2) serve the union of their requests in - * the best possible order for throughput. - */ - bfqq = bfqq_find_close(bfqd, cur_bfqq, sector); - if (!bfqq || bfqq == cur_bfqq) - return NULL; - - return bfqq; -} - -static struct bfq_queue * -bfq_setup_merge(struct bfq_queue *bfqq, struct bfq_queue *new_bfqq) -{ - int process_refs, new_process_refs; - struct bfq_queue *__bfqq; - - /* - * If there are no process references on the new_bfqq, then it is - * unsafe to follow the ->new_bfqq chain as other bfqq's in the chain - * may have dropped their last reference (not just their last process - * reference). - */ - if (!bfqq_process_refs(new_bfqq)) - return NULL; - - /* Avoid a circular list and skip interim queue merges. */ - while ((__bfqq = new_bfqq->new_bfqq)) { - if (__bfqq == bfqq) - return NULL; - new_bfqq = __bfqq; - } - - process_refs = bfqq_process_refs(bfqq); - new_process_refs = bfqq_process_refs(new_bfqq); - /* - * If the process for the bfqq has gone away, there is no - * sense in merging the queues. - */ - if (process_refs == 0 || new_process_refs == 0) - return NULL; - - /* - * Make sure merged queues belong to the same parent. Parents could - * have changed since the time we decided the two queues are suitable - * for merging. - */ - if (new_bfqq->entity.parent != bfqq->entity.parent) - return NULL; - - bfq_log_bfqq(bfqq->bfqd, bfqq, "scheduling merge with queue %d", - new_bfqq->pid); - - /* - * Merging is just a redirection: the requests of the process - * owning one of the two queues are redirected to the other queue. - * The latter queue, in its turn, is set as shared if this is the - * first time that the requests of some process are redirected to - * it. - * - * We redirect bfqq to new_bfqq and not the opposite, because - * we are in the context of the process owning bfqq, thus we - * have the io_cq of this process. So we can immediately - * configure this io_cq to redirect the requests of the - * process to new_bfqq. In contrast, the io_cq of new_bfqq is - * not available any more (new_bfqq->bic == NULL). - * - * Anyway, even in case new_bfqq coincides with the in-service - * queue, redirecting requests the in-service queue is the - * best option, as we feed the in-service queue with new - * requests close to the last request served and, by doing so, - * are likely to increase the throughput. - */ - bfqq->new_bfqq = new_bfqq; - /* - * The above assignment schedules the following redirections: - * each time some I/O for bfqq arrives, the process that - * generated that I/O is disassociated from bfqq and - * associated with new_bfqq. Here we increases new_bfqq->ref - * in advance, adding the number of processes that are - * expected to be associated with new_bfqq as they happen to - * issue I/O. - */ - new_bfqq->ref += process_refs; - return new_bfqq; -} - -static bool bfq_may_be_close_cooperator(struct bfq_queue *bfqq, - struct bfq_queue *new_bfqq) -{ - if (bfq_too_late_for_merging(new_bfqq)) - return false; - - if (bfq_class_idle(bfqq) || bfq_class_idle(new_bfqq) || - (bfqq->ioprio_class != new_bfqq->ioprio_class)) - return false; - - /* - * If either of the queues has already been detected as seeky, - * then merging it with the other queue is unlikely to lead to - * sequential I/O. - */ - if (BFQQ_SEEKY(bfqq) || BFQQ_SEEKY(new_bfqq)) - return false; - - /* - * Interleaved I/O is known to be done by (some) applications - * only for reads, so it does not make sense to merge async - * queues. - */ - if (!bfq_bfqq_sync(bfqq) || !bfq_bfqq_sync(new_bfqq)) - return false; - - return true; -} - -static bool idling_boosts_thr_without_issues(struct bfq_data *bfqd, - struct bfq_queue *bfqq); - -static struct bfq_queue * -bfq_setup_stable_merge(struct bfq_data *bfqd, struct bfq_queue *bfqq, - struct bfq_queue *stable_merge_bfqq, - struct bfq_iocq_bfqq_data *bfqq_data) -{ - int proc_ref = min(bfqq_process_refs(bfqq), - bfqq_process_refs(stable_merge_bfqq)); - struct bfq_queue *new_bfqq = NULL; - - bfqq_data->stable_merge_bfqq = NULL; - if (idling_boosts_thr_without_issues(bfqd, bfqq) || proc_ref == 0) - goto out; - - /* next function will take at least one ref */ - new_bfqq = bfq_setup_merge(bfqq, stable_merge_bfqq); - - if (new_bfqq) { - bfqq_data->stably_merged = true; - if (new_bfqq->bic) { - unsigned int new_a_idx = new_bfqq->actuator_idx; - struct bfq_iocq_bfqq_data *new_bfqq_data = - &new_bfqq->bic->bfqq_data[new_a_idx]; - - new_bfqq_data->stably_merged = true; - } - } - -out: - /* deschedule stable merge, because done or aborted here */ - bfq_put_stable_ref(stable_merge_bfqq); - - return new_bfqq; -} - -/* - * Attempt to schedule a merge of bfqq with the currently in-service - * queue or with a close queue among the scheduled queues. Return - * NULL if no merge was scheduled, a pointer to the shared bfq_queue - * structure otherwise. - * - * The OOM queue is not allowed to participate to cooperation: in fact, since - * the requests temporarily redirected to the OOM queue could be redirected - * again to dedicated queues at any time, the state needed to correctly - * handle merging with the OOM queue would be quite complex and expensive - * to maintain. Besides, in such a critical condition as an out of memory, - * the benefits of queue merging may be little relevant, or even negligible. - * - * WARNING: queue merging may impair fairness among non-weight raised - * queues, for at least two reasons: 1) the original weight of a - * merged queue may change during the merged state, 2) even being the - * weight the same, a merged queue may be bloated with many more - * requests than the ones produced by its originally-associated - * process. - */ -static struct bfq_queue * -bfq_setup_cooperator(struct bfq_data *bfqd, struct bfq_queue *bfqq, - void *io_struct, bool request, struct bfq_io_cq *bic) -{ - struct bfq_queue *in_service_bfqq, *new_bfqq; - unsigned int a_idx = bfqq->actuator_idx; - struct bfq_iocq_bfqq_data *bfqq_data = &bic->bfqq_data[a_idx]; - - /* if a merge has already been setup, then proceed with that first */ - new_bfqq = bfqq->new_bfqq; - if (new_bfqq) { - while (new_bfqq->new_bfqq) - new_bfqq = new_bfqq->new_bfqq; - return new_bfqq; - } - - /* - * Check delayed stable merge for rotational or non-queueing - * devs. For this branch to be executed, bfqq must not be - * currently merged with some other queue (i.e., bfqq->bic - * must be non null). If we considered also merged queues, - * then we should also check whether bfqq has already been - * merged with bic->stable_merge_bfqq. But this would be - * costly and complicated. - */ - if (unlikely(!bfqd->nonrot_with_queueing)) { - /* - * Make sure also that bfqq is sync, because - * bic->stable_merge_bfqq may point to some queue (for - * stable merging) also if bic is associated with a - * sync queue, but this bfqq is async - */ - if (bfq_bfqq_sync(bfqq) && bfqq_data->stable_merge_bfqq && - !bfq_bfqq_just_created(bfqq) && - time_is_before_jiffies(bfqq->split_time + - msecs_to_jiffies(bfq_late_stable_merging)) && - time_is_before_jiffies(bfqq->creation_time + - msecs_to_jiffies(bfq_late_stable_merging))) { - struct bfq_queue *stable_merge_bfqq = - bfqq_data->stable_merge_bfqq; - - return bfq_setup_stable_merge(bfqd, bfqq, - stable_merge_bfqq, - bfqq_data); - } - } - - /* - * Do not perform queue merging if the device is non - * rotational and performs internal queueing. In fact, such a - * device reaches a high speed through internal parallelism - * and pipelining. This means that, to reach a high - * throughput, it must have many requests enqueued at the same - * time. But, in this configuration, the internal scheduling - * algorithm of the device does exactly the job of queue - * merging: it reorders requests so as to obtain as much as - * possible a sequential I/O pattern. As a consequence, with - * the workload generated by processes doing interleaved I/O, - * the throughput reached by the device is likely to be the - * same, with and without queue merging. - * - * Disabling merging also provides a remarkable benefit in - * terms of throughput. Merging tends to make many workloads - * artificially more uneven, because of shared queues - * remaining non empty for incomparably more time than - * non-merged queues. This may accentuate workload - * asymmetries. For example, if one of the queues in a set of - * merged queues has a higher weight than a normal queue, then - * the shared queue may inherit such a high weight and, by - * staying almost always active, may force BFQ to perform I/O - * plugging most of the time. This evidently makes it harder - * for BFQ to let the device reach a high throughput. - * - * Finally, the likely() macro below is not used because one - * of the two branches is more likely than the other, but to - * have the code path after the following if() executed as - * fast as possible for the case of a non rotational device - * with queueing. We want it because this is the fastest kind - * of device. On the opposite end, the likely() may lengthen - * the execution time of BFQ for the case of slower devices - * (rotational or at least without queueing). But in this case - * the execution time of BFQ matters very little, if not at - * all. - */ - if (likely(bfqd->nonrot_with_queueing)) - return NULL; - - /* - * Prevent bfqq from being merged if it has been created too - * long ago. The idea is that true cooperating processes, and - * thus their associated bfq_queues, are supposed to be - * created shortly after each other. This is the case, e.g., - * for KVM/QEMU and dump I/O threads. Basing on this - * assumption, the following filtering greatly reduces the - * probability that two non-cooperating processes, which just - * happen to do close I/O for some short time interval, have - * their queues merged by mistake. - */ - if (bfq_too_late_for_merging(bfqq)) - return NULL; - - if (!io_struct || unlikely(bfqq == &bfqd->oom_bfqq)) - return NULL; - - /* If there is only one backlogged queue, don't search. */ - if (bfq_tot_busy_queues(bfqd) == 1) - return NULL; - - in_service_bfqq = bfqd->in_service_queue; - - if (in_service_bfqq && in_service_bfqq != bfqq && - likely(in_service_bfqq != &bfqd->oom_bfqq) && - bfq_rq_close_to_sector(io_struct, request, - bfqd->in_serv_last_pos) && - bfqq->entity.parent == in_service_bfqq->entity.parent && - bfq_may_be_close_cooperator(bfqq, in_service_bfqq)) { - new_bfqq = bfq_setup_merge(bfqq, in_service_bfqq); - if (new_bfqq) - return new_bfqq; - } - /* - * Check whether there is a cooperator among currently scheduled - * queues. The only thing we need is that the bio/request is not - * NULL, as we need it to establish whether a cooperator exists. - */ - new_bfqq = bfq_find_close_cooperator(bfqd, bfqq, - bfq_io_struct_pos(io_struct, request)); - - if (new_bfqq && likely(new_bfqq != &bfqd->oom_bfqq) && - bfq_may_be_close_cooperator(bfqq, new_bfqq)) - return bfq_setup_merge(bfqq, new_bfqq); - - return NULL; -} - -static void bfq_bfqq_save_state(struct bfq_queue *bfqq) -{ - struct bfq_io_cq *bic = bfqq->bic; - unsigned int a_idx = bfqq->actuator_idx; - struct bfq_iocq_bfqq_data *bfqq_data = &bic->bfqq_data[a_idx]; - - /* - * If !bfqq->bic, the queue is already shared or its requests - * have already been redirected to a shared queue; both idle window - * and weight raising state have already been saved. Do nothing. - */ - if (!bic) - return; - - bfqq_data->saved_last_serv_time_ns = bfqq->last_serv_time_ns; - bfqq_data->saved_inject_limit = bfqq->inject_limit; - bfqq_data->saved_decrease_time_jif = bfqq->decrease_time_jif; - - bfqq_data->saved_weight = bfqq->entity.orig_weight; - bfqq_data->saved_ttime = bfqq->ttime; - bfqq_data->saved_has_short_ttime = - bfq_bfqq_has_short_ttime(bfqq); - bfqq_data->saved_IO_bound = bfq_bfqq_IO_bound(bfqq); - bfqq_data->saved_io_start_time = bfqq->io_start_time; - bfqq_data->saved_tot_idle_time = bfqq->tot_idle_time; - bfqq_data->saved_in_large_burst = bfq_bfqq_in_large_burst(bfqq); - bfqq_data->was_in_burst_list = - !hlist_unhashed(&bfqq->burst_list_node); - - if (unlikely(bfq_bfqq_just_created(bfqq) && - !bfq_bfqq_in_large_burst(bfqq) && - bfqq->bfqd->low_latency)) { - /* - * bfqq being merged right after being created: bfqq - * would have deserved interactive weight raising, but - * did not make it to be set in a weight-raised state, - * because of this early merge. Store directly the - * weight-raising state that would have been assigned - * to bfqq, so that to avoid that bfqq unjustly fails - * to enjoy weight raising if split soon. - */ - bfqq_data->saved_wr_coeff = bfqq->bfqd->bfq_wr_coeff; - bfqq_data->saved_wr_start_at_switch_to_srt = - bfq_smallest_from_now(); - bfqq_data->saved_wr_cur_max_time = - bfq_wr_duration(bfqq->bfqd); - bfqq_data->saved_last_wr_start_finish = jiffies; - } else { - bfqq_data->saved_wr_coeff = bfqq->wr_coeff; - bfqq_data->saved_wr_start_at_switch_to_srt = - bfqq->wr_start_at_switch_to_srt; - bfqq_data->saved_service_from_wr = - bfqq->service_from_wr; - bfqq_data->saved_last_wr_start_finish = - bfqq->last_wr_start_finish; - bfqq_data->saved_wr_cur_max_time = bfqq->wr_cur_max_time; - } -} - - -void bfq_reassign_last_bfqq(struct bfq_queue *cur_bfqq, - struct bfq_queue *new_bfqq) -{ - if (cur_bfqq->entity.parent && - cur_bfqq->entity.parent->last_bfqq_created == cur_bfqq) - cur_bfqq->entity.parent->last_bfqq_created = new_bfqq; - else if (cur_bfqq->bfqd && cur_bfqq->bfqd->last_bfqq_created == cur_bfqq) - cur_bfqq->bfqd->last_bfqq_created = new_bfqq; -} - -void bfq_release_process_ref(struct bfq_data *bfqd, struct bfq_queue *bfqq) -{ - /* - * To prevent bfqq's service guarantees from being violated, - * bfqq may be left busy, i.e., queued for service, even if - * empty (see comments in __bfq_bfqq_expire() for - * details). But, if no process will send requests to bfqq any - * longer, then there is no point in keeping bfqq queued for - * service. In addition, keeping bfqq queued for service, but - * with no process ref any longer, may have caused bfqq to be - * freed when dequeued from service. But this is assumed to - * never happen. - */ - if (bfq_bfqq_busy(bfqq) && RB_EMPTY_ROOT(&bfqq->sort_list) && - bfqq != bfqd->in_service_queue) - bfq_del_bfqq_busy(bfqq, false); - - bfq_reassign_last_bfqq(bfqq, NULL); - - bfq_put_queue(bfqq); -} - -static struct bfq_queue *bfq_merge_bfqqs(struct bfq_data *bfqd, - struct bfq_io_cq *bic, - struct bfq_queue *bfqq) -{ - struct bfq_queue *new_bfqq = bfqq->new_bfqq; - - bfq_log_bfqq(bfqd, bfqq, "merging with queue %lu", - (unsigned long)new_bfqq->pid); - /* Save weight raising and idle window of the merged queues */ - bfq_bfqq_save_state(bfqq); - bfq_bfqq_save_state(new_bfqq); - if (bfq_bfqq_IO_bound(bfqq)) - bfq_mark_bfqq_IO_bound(new_bfqq); - bfq_clear_bfqq_IO_bound(bfqq); - - /* - * The processes associated with bfqq are cooperators of the - * processes associated with new_bfqq. So, if bfqq has a - * waker, then assume that all these processes will be happy - * to let bfqq's waker freely inject I/O when they have no - * I/O. - */ - if (bfqq->waker_bfqq && !new_bfqq->waker_bfqq && - bfqq->waker_bfqq != new_bfqq) { - new_bfqq->waker_bfqq = bfqq->waker_bfqq; - new_bfqq->tentative_waker_bfqq = NULL; - - /* - * If the waker queue disappears, then - * new_bfqq->waker_bfqq must be reset. So insert - * new_bfqq into the woken_list of the waker. See - * bfq_check_waker for details. - */ - hlist_add_head(&new_bfqq->woken_list_node, - &new_bfqq->waker_bfqq->woken_list); - - } - - /* - * If bfqq is weight-raised, then let new_bfqq inherit - * weight-raising. To reduce false positives, neglect the case - * where bfqq has just been created, but has not yet made it - * to be weight-raised (which may happen because EQM may merge - * bfqq even before bfq_add_request is executed for the first - * time for bfqq). Handling this case would however be very - * easy, thanks to the flag just_created. - */ - if (new_bfqq->wr_coeff == 1 && bfqq->wr_coeff > 1) { - new_bfqq->wr_coeff = bfqq->wr_coeff; - new_bfqq->wr_cur_max_time = bfqq->wr_cur_max_time; - new_bfqq->last_wr_start_finish = bfqq->last_wr_start_finish; - new_bfqq->wr_start_at_switch_to_srt = - bfqq->wr_start_at_switch_to_srt; - if (bfq_bfqq_busy(new_bfqq)) - bfqd->wr_busy_queues++; - new_bfqq->entity.prio_changed = 1; - } - - if (bfqq->wr_coeff > 1) { /* bfqq has given its wr to new_bfqq */ - bfqq->wr_coeff = 1; - bfqq->entity.prio_changed = 1; - if (bfq_bfqq_busy(bfqq)) - bfqd->wr_busy_queues--; - } - - bfq_log_bfqq(bfqd, new_bfqq, "merge_bfqqs: wr_busy %d", - bfqd->wr_busy_queues); - - /* - * Merge queues (that is, let bic redirect its requests to new_bfqq) - */ - bic_set_bfqq(bic, new_bfqq, true, bfqq->actuator_idx); - bfq_mark_bfqq_coop(new_bfqq); - /* - * new_bfqq now belongs to at least two bics (it is a shared queue): - * set new_bfqq->bic to NULL. bfqq either: - * - does not belong to any bic any more, and hence bfqq->bic must - * be set to NULL, or - * - is a queue whose owning bics have already been redirected to a - * different queue, hence the queue is destined to not belong to - * any bic soon and bfqq->bic is already NULL (therefore the next - * assignment causes no harm). - */ - new_bfqq->bic = NULL; - /* - * If the queue is shared, the pid is the pid of one of the associated - * processes. Which pid depends on the exact sequence of merge events - * the queue underwent. So printing such a pid is useless and confusing - * because it reports a random pid between those of the associated - * processes. - * We mark such a queue with a pid -1, and then print SHARED instead of - * a pid in logging messages. - */ - new_bfqq->pid = -1; - bfqq->bic = NULL; - - bfq_reassign_last_bfqq(bfqq, new_bfqq); - - bfq_release_process_ref(bfqd, bfqq); - - return new_bfqq; -} - -static bool bfq_allow_bio_merge(struct request_queue *q, struct request *rq, - struct bio *bio) -{ - struct bfq_data *bfqd = q->elevator->elevator_data; - bool is_sync = op_is_sync(bio->bi_opf); - struct bfq_queue *bfqq = bfqd->bio_bfqq, *new_bfqq; - - /* - * Disallow merge of a sync bio into an async request. - */ - if (is_sync && !rq_is_sync(rq)) - return false; - - /* - * Lookup the bfqq that this bio will be queued with. Allow - * merge only if rq is queued there. - */ - if (!bfqq) - return false; - - /* - * We take advantage of this function to perform an early merge - * of the queues of possible cooperating processes. - */ - new_bfqq = bfq_setup_cooperator(bfqd, bfqq, bio, false, bfqd->bio_bic); - if (new_bfqq) { - /* - * bic still points to bfqq, then it has not yet been - * redirected to some other bfq_queue, and a queue - * merge between bfqq and new_bfqq can be safely - * fulfilled, i.e., bic can be redirected to new_bfqq - * and bfqq can be put. - */ - while (bfqq != new_bfqq) - bfqq = bfq_merge_bfqqs(bfqd, bfqd->bio_bic, bfqq); - - /* - * Change also bqfd->bio_bfqq, as - * bfqd->bio_bic now points to new_bfqq, and - * this function may be invoked again (and then may - * use again bqfd->bio_bfqq). - */ - bfqd->bio_bfqq = bfqq; - } - - return bfqq == RQ_BFQQ(rq); -} - -/* - * Set the maximum time for the in-service queue to consume its - * budget. This prevents seeky processes from lowering the throughput. - * In practice, a time-slice service scheme is used with seeky - * processes. - */ -static void bfq_set_budget_timeout(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - unsigned int timeout_coeff; - - if (bfqq->wr_cur_max_time == bfqd->bfq_wr_rt_max_time) - timeout_coeff = 1; - else - timeout_coeff = bfqq->entity.weight / bfqq->entity.orig_weight; - - bfqd->last_budget_start = blk_time_get(); - - bfqq->budget_timeout = jiffies + - bfqd->bfq_timeout * timeout_coeff; -} - -static void __bfq_set_in_service_queue(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - if (bfqq) { - bfq_clear_bfqq_fifo_expire(bfqq); - - bfqd->budgets_assigned = (bfqd->budgets_assigned * 7 + 256) / 8; - - if (time_is_before_jiffies(bfqq->last_wr_start_finish) && - bfqq->wr_coeff > 1 && - bfqq->wr_cur_max_time == bfqd->bfq_wr_rt_max_time && - time_is_before_jiffies(bfqq->budget_timeout)) { - /* - * For soft real-time queues, move the start - * of the weight-raising period forward by the - * time the queue has not received any - * service. Otherwise, a relatively long - * service delay is likely to cause the - * weight-raising period of the queue to end, - * because of the short duration of the - * weight-raising period of a soft real-time - * queue. It is worth noting that this move - * is not so dangerous for the other queues, - * because soft real-time queues are not - * greedy. - * - * To not add a further variable, we use the - * overloaded field budget_timeout to - * determine for how long the queue has not - * received service, i.e., how much time has - * elapsed since the queue expired. However, - * this is a little imprecise, because - * budget_timeout is set to jiffies if bfqq - * not only expires, but also remains with no - * request. - */ - if (time_after(bfqq->budget_timeout, - bfqq->last_wr_start_finish)) - bfqq->last_wr_start_finish += - jiffies - bfqq->budget_timeout; - else - bfqq->last_wr_start_finish = jiffies; - } - - bfq_set_budget_timeout(bfqd, bfqq); - bfq_log_bfqq(bfqd, bfqq, - "set_in_service_queue, cur-budget = %d", - bfqq->entity.budget); - } - - bfqd->in_service_queue = bfqq; - bfqd->in_serv_last_pos = 0; -} - -/* - * Get and set a new queue for service. - */ -static struct bfq_queue *bfq_set_in_service_queue(struct bfq_data *bfqd) -{ - struct bfq_queue *bfqq = bfq_get_next_queue(bfqd); - - __bfq_set_in_service_queue(bfqd, bfqq); - return bfqq; -} - -static void bfq_arm_slice_timer(struct bfq_data *bfqd) -{ - struct bfq_queue *bfqq = bfqd->in_service_queue; - u32 sl; - - bfq_mark_bfqq_wait_request(bfqq); - - /* - * We don't want to idle for seeks, but we do want to allow - * fair distribution of slice time for a process doing back-to-back - * seeks. So allow a little bit of time for him to submit a new rq. - */ - sl = bfqd->bfq_slice_idle; - /* - * Unless the queue is being weight-raised or the scenario is - * asymmetric, grant only minimum idle time if the queue - * is seeky. A long idling is preserved for a weight-raised - * queue, or, more in general, in an asymmetric scenario, - * because a long idling is needed for guaranteeing to a queue - * its reserved share of the throughput (in particular, it is - * needed if the queue has a higher weight than some other - * queue). - */ - if (BFQQ_SEEKY(bfqq) && bfqq->wr_coeff == 1 && - !bfq_asymmetric_scenario(bfqd, bfqq)) - sl = min_t(u64, sl, BFQ_MIN_TT); - else if (bfqq->wr_coeff > 1) - sl = max_t(u32, sl, 20ULL * NSEC_PER_MSEC); - - bfqd->last_idling_start = blk_time_get(); - bfqd->last_idling_start_jiffies = jiffies; - - hrtimer_start(&bfqd->idle_slice_timer, ns_to_ktime(sl), - HRTIMER_MODE_REL); - bfqg_stats_set_start_idle_time(bfqq_group(bfqq)); -} - -/* - * In autotuning mode, max_budget is dynamically recomputed as the - * amount of sectors transferred in timeout at the estimated peak - * rate. This enables BFQ to utilize a full timeslice with a full - * budget, even if the in-service queue is served at peak rate. And - * this maximises throughput with sequential workloads. - */ -static unsigned long bfq_calc_max_budget(struct bfq_data *bfqd) -{ - return (u64)bfqd->peak_rate * USEC_PER_MSEC * - jiffies_to_msecs(bfqd->bfq_timeout)>>BFQ_RATE_SHIFT; -} - -/* - * Update parameters related to throughput and responsiveness, as a - * function of the estimated peak rate. See comments on - * bfq_calc_max_budget(), and on the ref_wr_duration array. - */ -static void update_thr_responsiveness_params(struct bfq_data *bfqd) -{ - if (bfqd->bfq_user_max_budget == 0) { - bfqd->bfq_max_budget = - bfq_calc_max_budget(bfqd); - bfq_log(bfqd, "new max_budget = %d", bfqd->bfq_max_budget); - } -} - -static void bfq_reset_rate_computation(struct bfq_data *bfqd, - struct request *rq) -{ - if (rq != NULL) { /* new rq dispatch now, reset accordingly */ - bfqd->last_dispatch = bfqd->first_dispatch = blk_time_get_ns(); - bfqd->peak_rate_samples = 1; - bfqd->sequential_samples = 0; - bfqd->tot_sectors_dispatched = bfqd->last_rq_max_size = - blk_rq_sectors(rq); - } else /* no new rq dispatched, just reset the number of samples */ - bfqd->peak_rate_samples = 0; /* full re-init on next disp. */ - - bfq_log(bfqd, - "reset_rate_computation at end, sample %u/%u tot_sects %llu", - bfqd->peak_rate_samples, bfqd->sequential_samples, - bfqd->tot_sectors_dispatched); -} - -static void bfq_update_rate_reset(struct bfq_data *bfqd, struct request *rq) -{ - u32 rate, weight, divisor; - - /* - * For the convergence property to hold (see comments on - * bfq_update_peak_rate()) and for the assessment to be - * reliable, a minimum number of samples must be present, and - * a minimum amount of time must have elapsed. If not so, do - * not compute new rate. Just reset parameters, to get ready - * for a new evaluation attempt. - */ - if (bfqd->peak_rate_samples < BFQ_RATE_MIN_SAMPLES || - bfqd->delta_from_first < BFQ_RATE_MIN_INTERVAL) - goto reset_computation; - - /* - * If a new request completion has occurred after last - * dispatch, then, to approximate the rate at which requests - * have been served by the device, it is more precise to - * extend the observation interval to the last completion. - */ - bfqd->delta_from_first = - max_t(u64, bfqd->delta_from_first, - bfqd->last_completion - bfqd->first_dispatch); - - /* - * Rate computed in sects/usec, and not sects/nsec, for - * precision issues. - */ - rate = div64_ul(bfqd->tot_sectors_dispatched<delta_from_first, NSEC_PER_USEC)); - - /* - * Peak rate not updated if: - * - the percentage of sequential dispatches is below 3/4 of the - * total, and rate is below the current estimated peak rate - * - rate is unreasonably high (> 20M sectors/sec) - */ - if ((bfqd->sequential_samples < (3 * bfqd->peak_rate_samples)>>2 && - rate <= bfqd->peak_rate) || - rate > 20<sequential_samples cannot - * become equal to bfqd->peak_rate_samples, which, in its - * turn, holds true because bfqd->sequential_samples is not - * incremented for the first sample. - */ - weight = (9 * bfqd->sequential_samples) / bfqd->peak_rate_samples; - - /* - * Second step: further refine the weight as a function of the - * duration of the observation interval. - */ - weight = min_t(u32, 8, - div_u64(weight * bfqd->delta_from_first, - BFQ_RATE_REF_INTERVAL)); - - /* - * Divisor ranging from 10, for minimum weight, to 2, for - * maximum weight. - */ - divisor = 10 - weight; - - /* - * Finally, update peak rate: - * - * peak_rate = peak_rate * (divisor-1) / divisor + rate / divisor - */ - bfqd->peak_rate *= divisor-1; - bfqd->peak_rate /= divisor; - rate /= divisor; /* smoothing constant alpha = 1/divisor */ - - bfqd->peak_rate += rate; - - /* - * For a very slow device, bfqd->peak_rate can reach 0 (see - * the minimum representable values reported in the comments - * on BFQ_RATE_SHIFT). Push to 1 if this happens, to avoid - * divisions by zero where bfqd->peak_rate is used as a - * divisor. - */ - bfqd->peak_rate = max_t(u32, 1, bfqd->peak_rate); - - update_thr_responsiveness_params(bfqd); - -reset_computation: - bfq_reset_rate_computation(bfqd, rq); -} - -/* - * Update the read/write peak rate (the main quantity used for - * auto-tuning, see update_thr_responsiveness_params()). - * - * It is not trivial to estimate the peak rate (correctly): because of - * the presence of sw and hw queues between the scheduler and the - * device components that finally serve I/O requests, it is hard to - * say exactly when a given dispatched request is served inside the - * device, and for how long. As a consequence, it is hard to know - * precisely at what rate a given set of requests is actually served - * by the device. - * - * On the opposite end, the dispatch time of any request is trivially - * available, and, from this piece of information, the "dispatch rate" - * of requests can be immediately computed. So, the idea in the next - * function is to use what is known, namely request dispatch times - * (plus, when useful, request completion times), to estimate what is - * unknown, namely in-device request service rate. - * - * The main issue is that, because of the above facts, the rate at - * which a certain set of requests is dispatched over a certain time - * interval can vary greatly with respect to the rate at which the - * same requests are then served. But, since the size of any - * intermediate queue is limited, and the service scheme is lossless - * (no request is silently dropped), the following obvious convergence - * property holds: the number of requests dispatched MUST become - * closer and closer to the number of requests completed as the - * observation interval grows. This is the key property used in - * the next function to estimate the peak service rate as a function - * of the observed dispatch rate. The function assumes to be invoked - * on every request dispatch. - */ -static void bfq_update_peak_rate(struct bfq_data *bfqd, struct request *rq) -{ - u64 now_ns = blk_time_get_ns(); - - if (bfqd->peak_rate_samples == 0) { /* first dispatch */ - bfq_log(bfqd, "update_peak_rate: goto reset, samples %d", - bfqd->peak_rate_samples); - bfq_reset_rate_computation(bfqd, rq); - goto update_last_values; /* will add one sample */ - } - - /* - * Device idle for very long: the observation interval lasting - * up to this dispatch cannot be a valid observation interval - * for computing a new peak rate (similarly to the late- - * completion event in bfq_completed_request()). Go to - * update_rate_and_reset to have the following three steps - * taken: - * - close the observation interval at the last (previous) - * request dispatch or completion - * - compute rate, if possible, for that observation interval - * - start a new observation interval with this dispatch - */ - if (now_ns - bfqd->last_dispatch > 100*NSEC_PER_MSEC && - bfqd->tot_rq_in_driver == 0) - goto update_rate_and_reset; - - /* Update sampling information */ - bfqd->peak_rate_samples++; - - if ((bfqd->tot_rq_in_driver > 0 || - now_ns - bfqd->last_completion < BFQ_MIN_TT) - && !BFQ_RQ_SEEKY(bfqd, bfqd->last_position, rq)) - bfqd->sequential_samples++; - - bfqd->tot_sectors_dispatched += blk_rq_sectors(rq); - - /* Reset max observed rq size every 32 dispatches */ - if (likely(bfqd->peak_rate_samples % 32)) - bfqd->last_rq_max_size = - max_t(u32, blk_rq_sectors(rq), bfqd->last_rq_max_size); - else - bfqd->last_rq_max_size = blk_rq_sectors(rq); - - bfqd->delta_from_first = now_ns - bfqd->first_dispatch; - - /* Target observation interval not yet reached, go on sampling */ - if (bfqd->delta_from_first < BFQ_RATE_REF_INTERVAL) - goto update_last_values; - -update_rate_and_reset: - bfq_update_rate_reset(bfqd, rq); -update_last_values: - bfqd->last_position = blk_rq_pos(rq) + blk_rq_sectors(rq); - if (RQ_BFQQ(rq) == bfqd->in_service_queue) - bfqd->in_serv_last_pos = bfqd->last_position; - bfqd->last_dispatch = now_ns; -} - -/* - * Remove request from internal lists. - */ -static void bfq_dispatch_remove(struct request_queue *q, struct request *rq) -{ - struct bfq_queue *bfqq = RQ_BFQQ(rq); - - /* - * For consistency, the next instruction should have been - * executed after removing the request from the queue and - * dispatching it. We execute instead this instruction before - * bfq_remove_request() (and hence introduce a temporary - * inconsistency), for efficiency. In fact, should this - * dispatch occur for a non in-service bfqq, this anticipated - * increment prevents two counters related to bfqq->dispatched - * from risking to be, first, uselessly decremented, and then - * incremented again when the (new) value of bfqq->dispatched - * happens to be taken into account. - */ - bfqq->dispatched++; - bfq_update_peak_rate(q->elevator->elevator_data, rq); - - bfq_remove_request(q, rq); -} - -/* - * There is a case where idling does not have to be performed for - * throughput concerns, but to preserve the throughput share of - * the process associated with bfqq. - * - * To introduce this case, we can note that allowing the drive - * to enqueue more than one request at a time, and hence - * delegating de facto final scheduling decisions to the - * drive's internal scheduler, entails loss of control on the - * actual request service order. In particular, the critical - * situation is when requests from different processes happen - * to be present, at the same time, in the internal queue(s) - * of the drive. In such a situation, the drive, by deciding - * the service order of the internally-queued requests, does - * determine also the actual throughput distribution among - * these processes. But the drive typically has no notion or - * concern about per-process throughput distribution, and - * makes its decisions only on a per-request basis. Therefore, - * the service distribution enforced by the drive's internal - * scheduler is likely to coincide with the desired throughput - * distribution only in a completely symmetric, or favorably - * skewed scenario where: - * (i-a) each of these processes must get the same throughput as - * the others, - * (i-b) in case (i-a) does not hold, it holds that the process - * associated with bfqq must receive a lower or equal - * throughput than any of the other processes; - * (ii) the I/O of each process has the same properties, in - * terms of locality (sequential or random), direction - * (reads or writes), request sizes, greediness - * (from I/O-bound to sporadic), and so on; - - * In fact, in such a scenario, the drive tends to treat the requests - * of each process in about the same way as the requests of the - * others, and thus to provide each of these processes with about the - * same throughput. This is exactly the desired throughput - * distribution if (i-a) holds, or, if (i-b) holds instead, this is an - * even more convenient distribution for (the process associated with) - * bfqq. - * - * In contrast, in any asymmetric or unfavorable scenario, device - * idling (I/O-dispatch plugging) is certainly needed to guarantee - * that bfqq receives its assigned fraction of the device throughput - * (see [1] for details). - * - * The problem is that idling may significantly reduce throughput with - * certain combinations of types of I/O and devices. An important - * example is sync random I/O on flash storage with command - * queueing. So, unless bfqq falls in cases where idling also boosts - * throughput, it is important to check conditions (i-a), i(-b) and - * (ii) accurately, so as to avoid idling when not strictly needed for - * service guarantees. - * - * Unfortunately, it is extremely difficult to thoroughly check - * condition (ii). And, in case there are active groups, it becomes - * very difficult to check conditions (i-a) and (i-b) too. In fact, - * if there are active groups, then, for conditions (i-a) or (i-b) to - * become false 'indirectly', it is enough that an active group - * contains more active processes or sub-groups than some other active - * group. More precisely, for conditions (i-a) or (i-b) to become - * false because of such a group, it is not even necessary that the - * group is (still) active: it is sufficient that, even if the group - * has become inactive, some of its descendant processes still have - * some request already dispatched but still waiting for - * completion. In fact, requests have still to be guaranteed their - * share of the throughput even after being dispatched. In this - * respect, it is easy to show that, if a group frequently becomes - * inactive while still having in-flight requests, and if, when this - * happens, the group is not considered in the calculation of whether - * the scenario is asymmetric, then the group may fail to be - * guaranteed its fair share of the throughput (basically because - * idling may not be performed for the descendant processes of the - * group, but it had to be). We address this issue with the following - * bi-modal behavior, implemented in the function - * bfq_asymmetric_scenario(). - * - * If there are groups with requests waiting for completion - * (as commented above, some of these groups may even be - * already inactive), then the scenario is tagged as - * asymmetric, conservatively, without checking any of the - * conditions (i-a), (i-b) or (ii). So the device is idled for bfqq. - * This behavior matches also the fact that groups are created - * exactly if controlling I/O is a primary concern (to - * preserve bandwidth and latency guarantees). - * - * On the opposite end, if there are no groups with requests waiting - * for completion, then only conditions (i-a) and (i-b) are actually - * controlled, i.e., provided that conditions (i-a) or (i-b) holds, - * idling is not performed, regardless of whether condition (ii) - * holds. In other words, only if conditions (i-a) and (i-b) do not - * hold, then idling is allowed, and the device tends to be prevented - * from queueing many requests, possibly of several processes. Since - * there are no groups with requests waiting for completion, then, to - * control conditions (i-a) and (i-b) it is enough to check just - * whether all the queues with requests waiting for completion also - * have the same weight. - * - * Not checking condition (ii) evidently exposes bfqq to the - * risk of getting less throughput than its fair share. - * However, for queues with the same weight, a further - * mechanism, preemption, mitigates or even eliminates this - * problem. And it does so without consequences on overall - * throughput. This mechanism and its benefits are explained - * in the next three paragraphs. - * - * Even if a queue, say Q, is expired when it remains idle, Q - * can still preempt the new in-service queue if the next - * request of Q arrives soon (see the comments on - * bfq_bfqq_update_budg_for_activation). If all queues and - * groups have the same weight, this form of preemption, - * combined with the hole-recovery heuristic described in the - * comments on function bfq_bfqq_update_budg_for_activation, - * are enough to preserve a correct bandwidth distribution in - * the mid term, even without idling. In fact, even if not - * idling allows the internal queues of the device to contain - * many requests, and thus to reorder requests, we can rather - * safely assume that the internal scheduler still preserves a - * minimum of mid-term fairness. - * - * More precisely, this preemption-based, idleless approach - * provides fairness in terms of IOPS, and not sectors per - * second. This can be seen with a simple example. Suppose - * that there are two queues with the same weight, but that - * the first queue receives requests of 8 sectors, while the - * second queue receives requests of 1024 sectors. In - * addition, suppose that each of the two queues contains at - * most one request at a time, which implies that each queue - * always remains idle after it is served. Finally, after - * remaining idle, each queue receives very quickly a new - * request. It follows that the two queues are served - * alternatively, preempting each other if needed. This - * implies that, although both queues have the same weight, - * the queue with large requests receives a service that is - * 1024/8 times as high as the service received by the other - * queue. - * - * The motivation for using preemption instead of idling (for - * queues with the same weight) is that, by not idling, - * service guarantees are preserved (completely or at least in - * part) without minimally sacrificing throughput. And, if - * there is no active group, then the primary expectation for - * this device is probably a high throughput. - * - * We are now left only with explaining the two sub-conditions in the - * additional compound condition that is checked below for deciding - * whether the scenario is asymmetric. To explain the first - * sub-condition, we need to add that the function - * bfq_asymmetric_scenario checks the weights of only - * non-weight-raised queues, for efficiency reasons (see comments on - * bfq_weights_tree_add()). Then the fact that bfqq is weight-raised - * is checked explicitly here. More precisely, the compound condition - * below takes into account also the fact that, even if bfqq is being - * weight-raised, the scenario is still symmetric if all queues with - * requests waiting for completion happen to be - * weight-raised. Actually, we should be even more precise here, and - * differentiate between interactive weight raising and soft real-time - * weight raising. - * - * The second sub-condition checked in the compound condition is - * whether there is a fair amount of already in-flight I/O not - * belonging to bfqq. If so, I/O dispatching is to be plugged, for the - * following reason. The drive may decide to serve in-flight - * non-bfqq's I/O requests before bfqq's ones, thereby delaying the - * arrival of new I/O requests for bfqq (recall that bfqq is sync). If - * I/O-dispatching is not plugged, then, while bfqq remains empty, a - * basically uncontrolled amount of I/O from other queues may be - * dispatched too, possibly causing the service of bfqq's I/O to be - * delayed even longer in the drive. This problem gets more and more - * serious as the speed and the queue depth of the drive grow, - * because, as these two quantities grow, the probability to find no - * queue busy but many requests in flight grows too. By contrast, - * plugging I/O dispatching minimizes the delay induced by already - * in-flight I/O, and enables bfqq to recover the bandwidth it may - * lose because of this delay. - * - * As a side note, it is worth considering that the above - * device-idling countermeasures may however fail in the following - * unlucky scenario: if I/O-dispatch plugging is (correctly) disabled - * in a time period during which all symmetry sub-conditions hold, and - * therefore the device is allowed to enqueue many requests, but at - * some later point in time some sub-condition stops to hold, then it - * may become impossible to make requests be served in the desired - * order until all the requests already queued in the device have been - * served. The last sub-condition commented above somewhat mitigates - * this problem for weight-raised queues. - * - * However, as an additional mitigation for this problem, we preserve - * plugging for a special symmetric case that may suddenly turn into - * asymmetric: the case where only bfqq is busy. In this case, not - * expiring bfqq does not cause any harm to any other queues in terms - * of service guarantees. In contrast, it avoids the following unlucky - * sequence of events: (1) bfqq is expired, (2) a new queue with a - * lower weight than bfqq becomes busy (or more queues), (3) the new - * queue is served until a new request arrives for bfqq, (4) when bfqq - * is finally served, there are so many requests of the new queue in - * the drive that the pending requests for bfqq take a lot of time to - * be served. In particular, event (2) may case even already - * dispatched requests of bfqq to be delayed, inside the drive. So, to - * avoid this series of events, the scenario is preventively declared - * as asymmetric also if bfqq is the only busy queues - */ -static bool idling_needed_for_service_guarantees(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - int tot_busy_queues = bfq_tot_busy_queues(bfqd); - - /* No point in idling for bfqq if it won't get requests any longer */ - if (unlikely(!bfqq_process_refs(bfqq))) - return false; - - return (bfqq->wr_coeff > 1 && - (bfqd->wr_busy_queues < tot_busy_queues || - bfqd->tot_rq_in_driver >= bfqq->dispatched + 4)) || - bfq_asymmetric_scenario(bfqd, bfqq) || - tot_busy_queues == 1; -} - -static bool __bfq_bfqq_expire(struct bfq_data *bfqd, struct bfq_queue *bfqq, - enum bfqq_expiration reason) -{ - /* - * If this bfqq is shared between multiple processes, check - * to make sure that those processes are still issuing I/Os - * within the mean seek distance. If not, it may be time to - * break the queues apart again. - */ - if (bfq_bfqq_coop(bfqq) && BFQQ_SEEKY(bfqq)) - bfq_mark_bfqq_split_coop(bfqq); - - /* - * Consider queues with a higher finish virtual time than - * bfqq. If idling_needed_for_service_guarantees(bfqq) returns - * true, then bfqq's bandwidth would be violated if an - * uncontrolled amount of I/O from these queues were - * dispatched while bfqq is waiting for its new I/O to - * arrive. This is exactly what may happen if this is a forced - * expiration caused by a preemption attempt, and if bfqq is - * not re-scheduled. To prevent this from happening, re-queue - * bfqq if it needs I/O-dispatch plugging, even if it is - * empty. By doing so, bfqq is granted to be served before the - * above queues (provided that bfqq is of course eligible). - */ - if (RB_EMPTY_ROOT(&bfqq->sort_list) && - !(reason == BFQQE_PREEMPTED && - idling_needed_for_service_guarantees(bfqd, bfqq))) { - if (bfqq->dispatched == 0) - /* - * Overloading budget_timeout field to store - * the time at which the queue remains with no - * backlog and no outstanding request; used by - * the weight-raising mechanism. - */ - bfqq->budget_timeout = jiffies; - - bfq_del_bfqq_busy(bfqq, true); - } else { - bfq_requeue_bfqq(bfqd, bfqq, true); - /* - * Resort priority tree of potential close cooperators. - * See comments on bfq_pos_tree_add_move() for the unlikely(). - */ - if (unlikely(!bfqd->nonrot_with_queueing && - !RB_EMPTY_ROOT(&bfqq->sort_list))) - bfq_pos_tree_add_move(bfqd, bfqq); - } - - /* - * All in-service entities must have been properly deactivated - * or requeued before executing the next function, which - * resets all in-service entities as no more in service. This - * may cause bfqq to be freed. If this happens, the next - * function returns true. - */ - return __bfq_bfqd_reset_in_service(bfqd); -} - -/** - * __bfq_bfqq_recalc_budget - try to adapt the budget to the @bfqq behavior. - * @bfqd: device data. - * @bfqq: queue to update. - * @reason: reason for expiration. - * - * Handle the feedback on @bfqq budget at queue expiration. - * See the body for detailed comments. - */ -static void __bfq_bfqq_recalc_budget(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - enum bfqq_expiration reason) -{ - struct request *next_rq; - int budget, min_budget; - - min_budget = bfq_min_budget(bfqd); - - if (bfqq->wr_coeff == 1) - budget = bfqq->max_budget; - else /* - * Use a constant, low budget for weight-raised queues, - * to help achieve a low latency. Keep it slightly higher - * than the minimum possible budget, to cause a little - * bit fewer expirations. - */ - budget = 2 * min_budget; - - bfq_log_bfqq(bfqd, bfqq, "recalc_budg: last budg %d, budg left %d", - bfqq->entity.budget, bfq_bfqq_budget_left(bfqq)); - bfq_log_bfqq(bfqd, bfqq, "recalc_budg: last max_budg %d, min budg %d", - budget, bfq_min_budget(bfqd)); - bfq_log_bfqq(bfqd, bfqq, "recalc_budg: sync %d, seeky %d", - bfq_bfqq_sync(bfqq), BFQQ_SEEKY(bfqd->in_service_queue)); - - if (bfq_bfqq_sync(bfqq) && bfqq->wr_coeff == 1) { - switch (reason) { - /* - * Caveat: in all the following cases we trade latency - * for throughput. - */ - case BFQQE_TOO_IDLE: - /* - * This is the only case where we may reduce - * the budget: if there is no request of the - * process still waiting for completion, then - * we assume (tentatively) that the timer has - * expired because the batch of requests of - * the process could have been served with a - * smaller budget. Hence, betting that - * process will behave in the same way when it - * becomes backlogged again, we reduce its - * next budget. As long as we guess right, - * this budget cut reduces the latency - * experienced by the process. - * - * However, if there are still outstanding - * requests, then the process may have not yet - * issued its next request just because it is - * still waiting for the completion of some of - * the still outstanding ones. So in this - * subcase we do not reduce its budget, on the - * contrary we increase it to possibly boost - * the throughput, as discussed in the - * comments to the BUDGET_TIMEOUT case. - */ - if (bfqq->dispatched > 0) /* still outstanding reqs */ - budget = min(budget * 2, bfqd->bfq_max_budget); - else { - if (budget > 5 * min_budget) - budget -= 4 * min_budget; - else - budget = min_budget; - } - break; - case BFQQE_BUDGET_TIMEOUT: - /* - * We double the budget here because it gives - * the chance to boost the throughput if this - * is not a seeky process (and has bumped into - * this timeout because of, e.g., ZBR). - */ - budget = min(budget * 2, bfqd->bfq_max_budget); - break; - case BFQQE_BUDGET_EXHAUSTED: - /* - * The process still has backlog, and did not - * let either the budget timeout or the disk - * idling timeout expire. Hence it is not - * seeky, has a short thinktime and may be - * happy with a higher budget too. So - * definitely increase the budget of this good - * candidate to boost the disk throughput. - */ - budget = min(budget * 4, bfqd->bfq_max_budget); - break; - case BFQQE_NO_MORE_REQUESTS: - /* - * For queues that expire for this reason, it - * is particularly important to keep the - * budget close to the actual service they - * need. Doing so reduces the timestamp - * misalignment problem described in the - * comments in the body of - * __bfq_activate_entity. In fact, suppose - * that a queue systematically expires for - * BFQQE_NO_MORE_REQUESTS and presents a - * new request in time to enjoy timestamp - * back-shifting. The larger the budget of the - * queue is with respect to the service the - * queue actually requests in each service - * slot, the more times the queue can be - * reactivated with the same virtual finish - * time. It follows that, even if this finish - * time is pushed to the system virtual time - * to reduce the consequent timestamp - * misalignment, the queue unjustly enjoys for - * many re-activations a lower finish time - * than all newly activated queues. - * - * The service needed by bfqq is measured - * quite precisely by bfqq->entity.service. - * Since bfqq does not enjoy device idling, - * bfqq->entity.service is equal to the number - * of sectors that the process associated with - * bfqq requested to read/write before waiting - * for request completions, or blocking for - * other reasons. - */ - budget = max_t(int, bfqq->entity.service, min_budget); - break; - default: - return; - } - } else if (!bfq_bfqq_sync(bfqq)) { - /* - * Async queues get always the maximum possible - * budget, as for them we do not care about latency - * (in addition, their ability to dispatch is limited - * by the charging factor). - */ - budget = bfqd->bfq_max_budget; - } - - bfqq->max_budget = budget; - - if (bfqd->budgets_assigned >= bfq_stats_min_budgets && - !bfqd->bfq_user_max_budget) - bfqq->max_budget = min(bfqq->max_budget, bfqd->bfq_max_budget); - - /* - * If there is still backlog, then assign a new budget, making - * sure that it is large enough for the next request. Since - * the finish time of bfqq must be kept in sync with the - * budget, be sure to call __bfq_bfqq_expire() *after* this - * update. - * - * If there is no backlog, then no need to update the budget; - * it will be updated on the arrival of a new request. - */ - next_rq = bfqq->next_rq; - if (next_rq) - bfqq->entity.budget = max_t(unsigned long, bfqq->max_budget, - bfq_serv_to_charge(next_rq, bfqq)); - - bfq_log_bfqq(bfqd, bfqq, "head sect: %u, new budget %d", - next_rq ? blk_rq_sectors(next_rq) : 0, - bfqq->entity.budget); -} - -/* - * Return true if the process associated with bfqq is "slow". The slow - * flag is used, in addition to the budget timeout, to reduce the - * amount of service provided to seeky processes, and thus reduce - * their chances to lower the throughput. More details in the comments - * on the function bfq_bfqq_expire(). - * - * An important observation is in order: as discussed in the comments - * on the function bfq_update_peak_rate(), with devices with internal - * queues, it is hard if ever possible to know when and for how long - * an I/O request is processed by the device (apart from the trivial - * I/O pattern where a new request is dispatched only after the - * previous one has been completed). This makes it hard to evaluate - * the real rate at which the I/O requests of each bfq_queue are - * served. In fact, for an I/O scheduler like BFQ, serving a - * bfq_queue means just dispatching its requests during its service - * slot (i.e., until the budget of the queue is exhausted, or the - * queue remains idle, or, finally, a timeout fires). But, during the - * service slot of a bfq_queue, around 100 ms at most, the device may - * be even still processing requests of bfq_queues served in previous - * service slots. On the opposite end, the requests of the in-service - * bfq_queue may be completed after the service slot of the queue - * finishes. - * - * Anyway, unless more sophisticated solutions are used - * (where possible), the sum of the sizes of the requests dispatched - * during the service slot of a bfq_queue is probably the only - * approximation available for the service received by the bfq_queue - * during its service slot. And this sum is the quantity used in this - * function to evaluate the I/O speed of a process. - */ -static bool bfq_bfqq_is_slow(struct bfq_data *bfqd, struct bfq_queue *bfqq, - bool compensate, unsigned long *delta_ms) -{ - ktime_t delta_ktime; - u32 delta_usecs; - bool slow = BFQQ_SEEKY(bfqq); /* if delta too short, use seekyness */ - - if (!bfq_bfqq_sync(bfqq)) - return false; - - if (compensate) - delta_ktime = bfqd->last_idling_start; - else - delta_ktime = blk_time_get(); - delta_ktime = ktime_sub(delta_ktime, bfqd->last_budget_start); - delta_usecs = ktime_to_us(delta_ktime); - - /* don't use too short time intervals */ - if (delta_usecs < 1000) { - if (blk_queue_nonrot(bfqd->queue)) - /* - * give same worst-case guarantees as idling - * for seeky - */ - *delta_ms = BFQ_MIN_TT / NSEC_PER_MSEC; - else /* charge at least one seek */ - *delta_ms = bfq_slice_idle / NSEC_PER_MSEC; - - return slow; - } - - *delta_ms = delta_usecs / USEC_PER_MSEC; - - /* - * Use only long (> 20ms) intervals to filter out excessive - * spikes in service rate estimation. - */ - if (delta_usecs > 20000) { - /* - * Caveat for rotational devices: processes doing I/O - * in the slower disk zones tend to be slow(er) even - * if not seeky. In this respect, the estimated peak - * rate is likely to be an average over the disk - * surface. Accordingly, to not be too harsh with - * unlucky processes, a process is deemed slow only if - * its rate has been lower than half of the estimated - * peak rate. - */ - slow = bfqq->entity.service < bfqd->bfq_max_budget / 2; - } - - bfq_log_bfqq(bfqd, bfqq, "bfq_bfqq_is_slow: slow %d", slow); - - return slow; -} - -/* - * To be deemed as soft real-time, an application must meet two - * requirements. First, the application must not require an average - * bandwidth higher than the approximate bandwidth required to playback or - * record a compressed high-definition video. - * The next function is invoked on the completion of the last request of a - * batch, to compute the next-start time instant, soft_rt_next_start, such - * that, if the next request of the application does not arrive before - * soft_rt_next_start, then the above requirement on the bandwidth is met. - * - * The second requirement is that the request pattern of the application is - * isochronous, i.e., that, after issuing a request or a batch of requests, - * the application stops issuing new requests until all its pending requests - * have been completed. After that, the application may issue a new batch, - * and so on. - * For this reason the next function is invoked to compute - * soft_rt_next_start only for applications that meet this requirement, - * whereas soft_rt_next_start is set to infinity for applications that do - * not. - * - * Unfortunately, even a greedy (i.e., I/O-bound) application may - * happen to meet, occasionally or systematically, both the above - * bandwidth and isochrony requirements. This may happen at least in - * the following circumstances. First, if the CPU load is high. The - * application may stop issuing requests while the CPUs are busy - * serving other processes, then restart, then stop again for a while, - * and so on. The other circumstances are related to the storage - * device: the storage device is highly loaded or reaches a low-enough - * throughput with the I/O of the application (e.g., because the I/O - * is random and/or the device is slow). In all these cases, the - * I/O of the application may be simply slowed down enough to meet - * the bandwidth and isochrony requirements. To reduce the probability - * that greedy applications are deemed as soft real-time in these - * corner cases, a further rule is used in the computation of - * soft_rt_next_start: the return value of this function is forced to - * be higher than the maximum between the following two quantities. - * - * (a) Current time plus: (1) the maximum time for which the arrival - * of a request is waited for when a sync queue becomes idle, - * namely bfqd->bfq_slice_idle, and (2) a few extra jiffies. We - * postpone for a moment the reason for adding a few extra - * jiffies; we get back to it after next item (b). Lower-bounding - * the return value of this function with the current time plus - * bfqd->bfq_slice_idle tends to filter out greedy applications, - * because the latter issue their next request as soon as possible - * after the last one has been completed. In contrast, a soft - * real-time application spends some time processing data, after a - * batch of its requests has been completed. - * - * (b) Current value of bfqq->soft_rt_next_start. As pointed out - * above, greedy applications may happen to meet both the - * bandwidth and isochrony requirements under heavy CPU or - * storage-device load. In more detail, in these scenarios, these - * applications happen, only for limited time periods, to do I/O - * slowly enough to meet all the requirements described so far, - * including the filtering in above item (a). These slow-speed - * time intervals are usually interspersed between other time - * intervals during which these applications do I/O at a very high - * speed. Fortunately, exactly because of the high speed of the - * I/O in the high-speed intervals, the values returned by this - * function happen to be so high, near the end of any such - * high-speed interval, to be likely to fall *after* the end of - * the low-speed time interval that follows. These high values are - * stored in bfqq->soft_rt_next_start after each invocation of - * this function. As a consequence, if the last value of - * bfqq->soft_rt_next_start is constantly used to lower-bound the - * next value that this function may return, then, from the very - * beginning of a low-speed interval, bfqq->soft_rt_next_start is - * likely to be constantly kept so high that any I/O request - * issued during the low-speed interval is considered as arriving - * to soon for the application to be deemed as soft - * real-time. Then, in the high-speed interval that follows, the - * application will not be deemed as soft real-time, just because - * it will do I/O at a high speed. And so on. - * - * Getting back to the filtering in item (a), in the following two - * cases this filtering might be easily passed by a greedy - * application, if the reference quantity was just - * bfqd->bfq_slice_idle: - * 1) HZ is so low that the duration of a jiffy is comparable to or - * higher than bfqd->bfq_slice_idle. This happens, e.g., on slow - * devices with HZ=100. The time granularity may be so coarse - * that the approximation, in jiffies, of bfqd->bfq_slice_idle - * is rather lower than the exact value. - * 2) jiffies, instead of increasing at a constant rate, may stop increasing - * for a while, then suddenly 'jump' by several units to recover the lost - * increments. This seems to happen, e.g., inside virtual machines. - * To address this issue, in the filtering in (a) we do not use as a - * reference time interval just bfqd->bfq_slice_idle, but - * bfqd->bfq_slice_idle plus a few jiffies. In particular, we add the - * minimum number of jiffies for which the filter seems to be quite - * precise also in embedded systems and KVM/QEMU virtual machines. - */ -static unsigned long bfq_bfqq_softrt_next_start(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - return max3(bfqq->soft_rt_next_start, - bfqq->last_idle_bklogged + - HZ * bfqq->service_from_backlogged / - bfqd->bfq_wr_max_softrt_rate, - jiffies + nsecs_to_jiffies(bfqq->bfqd->bfq_slice_idle) + 4); -} - -/** - * bfq_bfqq_expire - expire a queue. - * @bfqd: device owning the queue. - * @bfqq: the queue to expire. - * @compensate: if true, compensate for the time spent idling. - * @reason: the reason causing the expiration. - * - * If the process associated with bfqq does slow I/O (e.g., because it - * issues random requests), we charge bfqq with the time it has been - * in service instead of the service it has received (see - * bfq_bfqq_charge_time for details on how this goal is achieved). As - * a consequence, bfqq will typically get higher timestamps upon - * reactivation, and hence it will be rescheduled as if it had - * received more service than what it has actually received. In the - * end, bfqq receives less service in proportion to how slowly its - * associated process consumes its budgets (and hence how seriously it - * tends to lower the throughput). In addition, this time-charging - * strategy guarantees time fairness among slow processes. In - * contrast, if the process associated with bfqq is not slow, we - * charge bfqq exactly with the service it has received. - * - * Charging time to the first type of queues and the exact service to - * the other has the effect of using the WF2Q+ policy to schedule the - * former on a timeslice basis, without violating service domain - * guarantees among the latter. - */ -void bfq_bfqq_expire(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - bool compensate, - enum bfqq_expiration reason) -{ - bool slow; - unsigned long delta = 0; - struct bfq_entity *entity = &bfqq->entity; - - /* - * Check whether the process is slow (see bfq_bfqq_is_slow). - */ - slow = bfq_bfqq_is_slow(bfqd, bfqq, compensate, &delta); - - /* - * As above explained, charge slow (typically seeky) and - * timed-out queues with the time and not the service - * received, to favor sequential workloads. - * - * Processes doing I/O in the slower disk zones will tend to - * be slow(er) even if not seeky. Therefore, since the - * estimated peak rate is actually an average over the disk - * surface, these processes may timeout just for bad luck. To - * avoid punishing them, do not charge time to processes that - * succeeded in consuming at least 2/3 of their budget. This - * allows BFQ to preserve enough elasticity to still perform - * bandwidth, and not time, distribution with little unlucky - * or quasi-sequential processes. - */ - if (bfqq->wr_coeff == 1 && - (slow || - (reason == BFQQE_BUDGET_TIMEOUT && - bfq_bfqq_budget_left(bfqq) >= entity->budget / 3))) - bfq_bfqq_charge_time(bfqd, bfqq, delta); - - if (bfqd->low_latency && bfqq->wr_coeff == 1) - bfqq->last_wr_start_finish = jiffies; - - if (bfqd->low_latency && bfqd->bfq_wr_max_softrt_rate > 0 && - RB_EMPTY_ROOT(&bfqq->sort_list)) { - /* - * If we get here, and there are no outstanding - * requests, then the request pattern is isochronous - * (see the comments on the function - * bfq_bfqq_softrt_next_start()). Therefore we can - * compute soft_rt_next_start. - * - * If, instead, the queue still has outstanding - * requests, then we have to wait for the completion - * of all the outstanding requests to discover whether - * the request pattern is actually isochronous. - */ - if (bfqq->dispatched == 0) - bfqq->soft_rt_next_start = - bfq_bfqq_softrt_next_start(bfqd, bfqq); - else if (bfqq->dispatched > 0) { - /* - * Schedule an update of soft_rt_next_start to when - * the task may be discovered to be isochronous. - */ - bfq_mark_bfqq_softrt_update(bfqq); - } - } - - bfq_log_bfqq(bfqd, bfqq, - "expire (%d, slow %d, num_disp %d, short_ttime %d)", reason, - slow, bfqq->dispatched, bfq_bfqq_has_short_ttime(bfqq)); - - /* - * bfqq expired, so no total service time needs to be computed - * any longer: reset state machine for measuring total service - * times. - */ - bfqd->rqs_injected = bfqd->wait_dispatch = false; - bfqd->waited_rq = NULL; - - /* - * Increase, decrease or leave budget unchanged according to - * reason. - */ - __bfq_bfqq_recalc_budget(bfqd, bfqq, reason); - if (__bfq_bfqq_expire(bfqd, bfqq, reason)) - /* bfqq is gone, no more actions on it */ - return; - - /* mark bfqq as waiting a request only if a bic still points to it */ - if (!bfq_bfqq_busy(bfqq) && - reason != BFQQE_BUDGET_TIMEOUT && - reason != BFQQE_BUDGET_EXHAUSTED) { - bfq_mark_bfqq_non_blocking_wait_rq(bfqq); - /* - * Not setting service to 0, because, if the next rq - * arrives in time, the queue will go on receiving - * service with this same budget (as if it never expired) - */ - } else - entity->service = 0; - - /* - * Reset the received-service counter for every parent entity. - * Differently from what happens with bfqq->entity.service, - * the resetting of this counter never needs to be postponed - * for parent entities. In fact, in case bfqq may have a - * chance to go on being served using the last, partially - * consumed budget, bfqq->entity.service needs to be kept, - * because if bfqq then actually goes on being served using - * the same budget, the last value of bfqq->entity.service is - * needed to properly decrement bfqq->entity.budget by the - * portion already consumed. In contrast, it is not necessary - * to keep entity->service for parent entities too, because - * the bubble up of the new value of bfqq->entity.budget will - * make sure that the budgets of parent entities are correct, - * even in case bfqq and thus parent entities go on receiving - * service with the same budget. - */ - entity = entity->parent; - for_each_entity(entity) - entity->service = 0; -} - -/* - * Budget timeout is not implemented through a dedicated timer, but - * just checked on request arrivals and completions, as well as on - * idle timer expirations. - */ -static bool bfq_bfqq_budget_timeout(struct bfq_queue *bfqq) -{ - return time_is_before_eq_jiffies(bfqq->budget_timeout); -} - -/* - * If we expire a queue that is actively waiting (i.e., with the - * device idled) for the arrival of a new request, then we may incur - * the timestamp misalignment problem described in the body of the - * function __bfq_activate_entity. Hence we return true only if this - * condition does not hold, or if the queue is slow enough to deserve - * only to be kicked off for preserving a high throughput. - */ -static bool bfq_may_expire_for_budg_timeout(struct bfq_queue *bfqq) -{ - bfq_log_bfqq(bfqq->bfqd, bfqq, - "may_budget_timeout: wait_request %d left %d timeout %d", - bfq_bfqq_wait_request(bfqq), - bfq_bfqq_budget_left(bfqq) >= bfqq->entity.budget / 3, - bfq_bfqq_budget_timeout(bfqq)); - - return (!bfq_bfqq_wait_request(bfqq) || - bfq_bfqq_budget_left(bfqq) >= bfqq->entity.budget / 3) - && - bfq_bfqq_budget_timeout(bfqq); -} - -static bool idling_boosts_thr_without_issues(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - bool rot_without_queueing = - !blk_queue_nonrot(bfqd->queue) && !bfqd->hw_tag, - bfqq_sequential_and_IO_bound, - idling_boosts_thr; - - /* No point in idling for bfqq if it won't get requests any longer */ - if (unlikely(!bfqq_process_refs(bfqq))) - return false; - - bfqq_sequential_and_IO_bound = !BFQQ_SEEKY(bfqq) && - bfq_bfqq_IO_bound(bfqq) && bfq_bfqq_has_short_ttime(bfqq); - - /* - * The next variable takes into account the cases where idling - * boosts the throughput. - * - * The value of the variable is computed considering, first, that - * idling is virtually always beneficial for the throughput if: - * (a) the device is not NCQ-capable and rotational, or - * (b) regardless of the presence of NCQ, the device is rotational and - * the request pattern for bfqq is I/O-bound and sequential, or - * (c) regardless of whether it is rotational, the device is - * not NCQ-capable and the request pattern for bfqq is - * I/O-bound and sequential. - * - * Secondly, and in contrast to the above item (b), idling an - * NCQ-capable flash-based device would not boost the - * throughput even with sequential I/O; rather it would lower - * the throughput in proportion to how fast the device - * is. Accordingly, the next variable is true if any of the - * above conditions (a), (b) or (c) is true, and, in - * particular, happens to be false if bfqd is an NCQ-capable - * flash-based device. - */ - idling_boosts_thr = rot_without_queueing || - ((!blk_queue_nonrot(bfqd->queue) || !bfqd->hw_tag) && - bfqq_sequential_and_IO_bound); - - /* - * The return value of this function is equal to that of - * idling_boosts_thr, unless a special case holds. In this - * special case, described below, idling may cause problems to - * weight-raised queues. - * - * When the request pool is saturated (e.g., in the presence - * of write hogs), if the processes associated with - * non-weight-raised queues ask for requests at a lower rate, - * then processes associated with weight-raised queues have a - * higher probability to get a request from the pool - * immediately (or at least soon) when they need one. Thus - * they have a higher probability to actually get a fraction - * of the device throughput proportional to their high - * weight. This is especially true with NCQ-capable drives, - * which enqueue several requests in advance, and further - * reorder internally-queued requests. - * - * For this reason, we force to false the return value if - * there are weight-raised busy queues. In this case, and if - * bfqq is not weight-raised, this guarantees that the device - * is not idled for bfqq (if, instead, bfqq is weight-raised, - * then idling will be guaranteed by another variable, see - * below). Combined with the timestamping rules of BFQ (see - * [1] for details), this behavior causes bfqq, and hence any - * sync non-weight-raised queue, to get a lower number of - * requests served, and thus to ask for a lower number of - * requests from the request pool, before the busy - * weight-raised queues get served again. This often mitigates - * starvation problems in the presence of heavy write - * workloads and NCQ, thereby guaranteeing a higher - * application and system responsiveness in these hostile - * scenarios. - */ - return idling_boosts_thr && - bfqd->wr_busy_queues == 0; -} - -/* - * For a queue that becomes empty, device idling is allowed only if - * this function returns true for that queue. As a consequence, since - * device idling plays a critical role for both throughput boosting - * and service guarantees, the return value of this function plays a - * critical role as well. - * - * In a nutshell, this function returns true only if idling is - * beneficial for throughput or, even if detrimental for throughput, - * idling is however necessary to preserve service guarantees (low - * latency, desired throughput distribution, ...). In particular, on - * NCQ-capable devices, this function tries to return false, so as to - * help keep the drives' internal queues full, whenever this helps the - * device boost the throughput without causing any service-guarantee - * issue. - * - * Most of the issues taken into account to get the return value of - * this function are not trivial. We discuss these issues in the two - * functions providing the main pieces of information needed by this - * function. - */ -static bool bfq_better_to_idle(struct bfq_queue *bfqq) -{ - struct bfq_data *bfqd = bfqq->bfqd; - bool idling_boosts_thr_with_no_issue, idling_needed_for_service_guar; - - /* No point in idling for bfqq if it won't get requests any longer */ - if (unlikely(!bfqq_process_refs(bfqq))) - return false; - - if (unlikely(bfqd->strict_guarantees)) - return true; - - /* - * Idling is performed only if slice_idle > 0. In addition, we - * do not idle if - * (a) bfqq is async - * (b) bfqq is in the idle io prio class: in this case we do - * not idle because we want to minimize the bandwidth that - * queues in this class can steal to higher-priority queues - */ - if (bfqd->bfq_slice_idle == 0 || !bfq_bfqq_sync(bfqq) || - bfq_class_idle(bfqq)) - return false; - - idling_boosts_thr_with_no_issue = - idling_boosts_thr_without_issues(bfqd, bfqq); - - idling_needed_for_service_guar = - idling_needed_for_service_guarantees(bfqd, bfqq); - - /* - * We have now the two components we need to compute the - * return value of the function, which is true only if idling - * either boosts the throughput (without issues), or is - * necessary to preserve service guarantees. - */ - return idling_boosts_thr_with_no_issue || - idling_needed_for_service_guar; -} - -/* - * If the in-service queue is empty but the function bfq_better_to_idle - * returns true, then: - * 1) the queue must remain in service and cannot be expired, and - * 2) the device must be idled to wait for the possible arrival of a new - * request for the queue. - * See the comments on the function bfq_better_to_idle for the reasons - * why performing device idling is the best choice to boost the throughput - * and preserve service guarantees when bfq_better_to_idle itself - * returns true. - */ -static bool bfq_bfqq_must_idle(struct bfq_queue *bfqq) -{ - return RB_EMPTY_ROOT(&bfqq->sort_list) && bfq_better_to_idle(bfqq); -} - -/* - * This function chooses the queue from which to pick the next extra - * I/O request to inject, if it finds a compatible queue. See the - * comments on bfq_update_inject_limit() for details on the injection - * mechanism, and for the definitions of the quantities mentioned - * below. - */ -static struct bfq_queue * -bfq_choose_bfqq_for_injection(struct bfq_data *bfqd) -{ - struct bfq_queue *bfqq, *in_serv_bfqq = bfqd->in_service_queue; - unsigned int limit = in_serv_bfqq->inject_limit; - int i; - - /* - * If - * - bfqq is not weight-raised and therefore does not carry - * time-critical I/O, - * or - * - regardless of whether bfqq is weight-raised, bfqq has - * however a long think time, during which it can absorb the - * effect of an appropriate number of extra I/O requests - * from other queues (see bfq_update_inject_limit for - * details on the computation of this number); - * then injection can be performed without restrictions. - */ - bool in_serv_always_inject = in_serv_bfqq->wr_coeff == 1 || - !bfq_bfqq_has_short_ttime(in_serv_bfqq); - - /* - * If - * - the baseline total service time could not be sampled yet, - * so the inject limit happens to be still 0, and - * - a lot of time has elapsed since the plugging of I/O - * dispatching started, so drive speed is being wasted - * significantly; - * then temporarily raise inject limit to one request. - */ - if (limit == 0 && in_serv_bfqq->last_serv_time_ns == 0 && - bfq_bfqq_wait_request(in_serv_bfqq) && - time_is_before_eq_jiffies(bfqd->last_idling_start_jiffies + - bfqd->bfq_slice_idle) - ) - limit = 1; - - if (bfqd->tot_rq_in_driver >= limit) - return NULL; - - /* - * Linear search of the source queue for injection; but, with - * a high probability, very few steps are needed to find a - * candidate queue, i.e., a queue with enough budget left for - * its next request. In fact: - * - BFQ dynamically updates the budget of every queue so as - * to accommodate the expected backlog of the queue; - * - if a queue gets all its requests dispatched as injected - * service, then the queue is removed from the active list - * (and re-added only if it gets new requests, but then it - * is assigned again enough budget for its new backlog). - */ - for (i = 0; i < bfqd->num_actuators; i++) { - list_for_each_entry(bfqq, &bfqd->active_list[i], bfqq_list) - if (!RB_EMPTY_ROOT(&bfqq->sort_list) && - (in_serv_always_inject || bfqq->wr_coeff > 1) && - bfq_serv_to_charge(bfqq->next_rq, bfqq) <= - bfq_bfqq_budget_left(bfqq)) { - /* - * Allow for only one large in-flight request - * on non-rotational devices, for the - * following reason. On non-rotationl drives, - * large requests take much longer than - * smaller requests to be served. In addition, - * the drive prefers to serve large requests - * w.r.t. to small ones, if it can choose. So, - * having more than one large requests queued - * in the drive may easily make the next first - * request of the in-service queue wait for so - * long to break bfqq's service guarantees. On - * the bright side, large requests let the - * drive reach a very high throughput, even if - * there is only one in-flight large request - * at a time. - */ - if (blk_queue_nonrot(bfqd->queue) && - blk_rq_sectors(bfqq->next_rq) >= - BFQQ_SECT_THR_NONROT && - bfqd->tot_rq_in_driver >= 1) - continue; - else { - bfqd->rqs_injected = true; - return bfqq; - } - } - } - - return NULL; -} - -static struct bfq_queue * -bfq_find_active_bfqq_for_actuator(struct bfq_data *bfqd, int idx) -{ - struct bfq_queue *bfqq; - - if (bfqd->in_service_queue && - bfqd->in_service_queue->actuator_idx == idx) - return bfqd->in_service_queue; - - list_for_each_entry(bfqq, &bfqd->active_list[idx], bfqq_list) { - if (!RB_EMPTY_ROOT(&bfqq->sort_list) && - bfq_serv_to_charge(bfqq->next_rq, bfqq) <= - bfq_bfqq_budget_left(bfqq)) { - return bfqq; - } - } - - return NULL; -} - -/* - * Perform a linear scan of each actuator, until an actuator is found - * for which the following three conditions hold: the load of the - * actuator is below the threshold (see comments on - * actuator_load_threshold for details) and lower than that of the - * next actuator (comments on this extra condition below), and there - * is a queue that contains I/O for that actuator. On success, return - * that queue. - * - * Performing a plain linear scan entails a prioritization among - * actuators. The extra condition above breaks this prioritization and - * tends to distribute injection uniformly across actuators. - */ -static struct bfq_queue * -bfq_find_bfqq_for_underused_actuator(struct bfq_data *bfqd) -{ - int i; - - for (i = 0 ; i < bfqd->num_actuators; i++) { - if (bfqd->rq_in_driver[i] < bfqd->actuator_load_threshold && - (i == bfqd->num_actuators - 1 || - bfqd->rq_in_driver[i] < bfqd->rq_in_driver[i+1])) { - struct bfq_queue *bfqq = - bfq_find_active_bfqq_for_actuator(bfqd, i); - - if (bfqq) - return bfqq; - } - } - - return NULL; -} - - -/* - * Select a queue for service. If we have a current queue in service, - * check whether to continue servicing it, or retrieve and set a new one. - */ -static struct bfq_queue *bfq_select_queue(struct bfq_data *bfqd) -{ - struct bfq_queue *bfqq, *inject_bfqq; - struct request *next_rq; - enum bfqq_expiration reason = BFQQE_BUDGET_TIMEOUT; - - bfqq = bfqd->in_service_queue; - if (!bfqq) - goto new_queue; - - bfq_log_bfqq(bfqd, bfqq, "select_queue: already in-service queue"); - - /* - * Do not expire bfqq for budget timeout if bfqq may be about - * to enjoy device idling. The reason why, in this case, we - * prevent bfqq from expiring is the same as in the comments - * on the case where bfq_bfqq_must_idle() returns true, in - * bfq_completed_request(). - */ - if (bfq_may_expire_for_budg_timeout(bfqq) && - !bfq_bfqq_must_idle(bfqq)) - goto expire; - -check_queue: - /* - * If some actuator is underutilized, but the in-service - * queue does not contain I/O for that actuator, then try to - * inject I/O for that actuator. - */ - inject_bfqq = bfq_find_bfqq_for_underused_actuator(bfqd); - if (inject_bfqq && inject_bfqq != bfqq) - return inject_bfqq; - - /* - * This loop is rarely executed more than once. Even when it - * happens, it is much more convenient to re-execute this loop - * than to return NULL and trigger a new dispatch to get a - * request served. - */ - next_rq = bfqq->next_rq; - /* - * If bfqq has requests queued and it has enough budget left to - * serve them, keep the queue, otherwise expire it. - */ - if (next_rq) { - if (bfq_serv_to_charge(next_rq, bfqq) > - bfq_bfqq_budget_left(bfqq)) { - /* - * Expire the queue for budget exhaustion, - * which makes sure that the next budget is - * enough to serve the next request, even if - * it comes from the fifo expired path. - */ - reason = BFQQE_BUDGET_EXHAUSTED; - goto expire; - } else { - /* - * The idle timer may be pending because we may - * not disable disk idling even when a new request - * arrives. - */ - if (bfq_bfqq_wait_request(bfqq)) { - /* - * If we get here: 1) at least a new request - * has arrived but we have not disabled the - * timer because the request was too small, - * 2) then the block layer has unplugged - * the device, causing the dispatch to be - * invoked. - * - * Since the device is unplugged, now the - * requests are probably large enough to - * provide a reasonable throughput. - * So we disable idling. - */ - bfq_clear_bfqq_wait_request(bfqq); - hrtimer_try_to_cancel(&bfqd->idle_slice_timer); - } - goto keep_queue; - } - } - - /* - * No requests pending. However, if the in-service queue is idling - * for a new request, or has requests waiting for a completion and - * may idle after their completion, then keep it anyway. - * - * Yet, inject service from other queues if it boosts - * throughput and is possible. - */ - if (bfq_bfqq_wait_request(bfqq) || - (bfqq->dispatched != 0 && bfq_better_to_idle(bfqq))) { - unsigned int act_idx = bfqq->actuator_idx; - struct bfq_queue *async_bfqq = NULL; - struct bfq_queue *blocked_bfqq = - !hlist_empty(&bfqq->woken_list) ? - container_of(bfqq->woken_list.first, - struct bfq_queue, - woken_list_node) - : NULL; - - if (bfqq->bic && bfqq->bic->bfqq[0][act_idx] && - bfq_bfqq_busy(bfqq->bic->bfqq[0][act_idx]) && - bfqq->bic->bfqq[0][act_idx]->next_rq) - async_bfqq = bfqq->bic->bfqq[0][act_idx]; - /* - * The next four mutually-exclusive ifs decide - * whether to try injection, and choose the queue to - * pick an I/O request from. - * - * The first if checks whether the process associated - * with bfqq has also async I/O pending. If so, it - * injects such I/O unconditionally. Injecting async - * I/O from the same process can cause no harm to the - * process. On the contrary, it can only increase - * bandwidth and reduce latency for the process. - * - * The second if checks whether there happens to be a - * non-empty waker queue for bfqq, i.e., a queue whose - * I/O needs to be completed for bfqq to receive new - * I/O. This happens, e.g., if bfqq is associated with - * a process that does some sync. A sync generates - * extra blocking I/O, which must be completed before - * the process associated with bfqq can go on with its - * I/O. If the I/O of the waker queue is not served, - * then bfqq remains empty, and no I/O is dispatched, - * until the idle timeout fires for bfqq. This is - * likely to result in lower bandwidth and higher - * latencies for bfqq, and in a severe loss of total - * throughput. The best action to take is therefore to - * serve the waker queue as soon as possible. So do it - * (without relying on the third alternative below for - * eventually serving waker_bfqq's I/O; see the last - * paragraph for further details). This systematic - * injection of I/O from the waker queue does not - * cause any delay to bfqq's I/O. On the contrary, - * next bfqq's I/O is brought forward dramatically, - * for it is not blocked for milliseconds. - * - * The third if checks whether there is a queue woken - * by bfqq, and currently with pending I/O. Such a - * woken queue does not steal bandwidth from bfqq, - * because it remains soon without I/O if bfqq is not - * served. So there is virtually no risk of loss of - * bandwidth for bfqq if this woken queue has I/O - * dispatched while bfqq is waiting for new I/O. - * - * The fourth if checks whether bfqq is a queue for - * which it is better to avoid injection. It is so if - * bfqq delivers more throughput when served without - * any further I/O from other queues in the middle, or - * if the service times of bfqq's I/O requests both - * count more than overall throughput, and may be - * easily increased by injection (this happens if bfqq - * has a short think time). If none of these - * conditions holds, then a candidate queue for - * injection is looked for through - * bfq_choose_bfqq_for_injection(). Note that the - * latter may return NULL (for example if the inject - * limit for bfqq is currently 0). - * - * NOTE: motivation for the second alternative - * - * Thanks to the way the inject limit is updated in - * bfq_update_has_short_ttime(), it is rather likely - * that, if I/O is being plugged for bfqq and the - * waker queue has pending I/O requests that are - * blocking bfqq's I/O, then the fourth alternative - * above lets the waker queue get served before the - * I/O-plugging timeout fires. So one may deem the - * second alternative superfluous. It is not, because - * the fourth alternative may be way less effective in - * case of a synchronization. For two main - * reasons. First, throughput may be low because the - * inject limit may be too low to guarantee the same - * amount of injected I/O, from the waker queue or - * other queues, that the second alternative - * guarantees (the second alternative unconditionally - * injects a pending I/O request of the waker queue - * for each bfq_dispatch_request()). Second, with the - * fourth alternative, the duration of the plugging, - * i.e., the time before bfqq finally receives new I/O, - * may not be minimized, because the waker queue may - * happen to be served only after other queues. - */ - if (async_bfqq && - icq_to_bic(async_bfqq->next_rq->elv.icq) == bfqq->bic && - bfq_serv_to_charge(async_bfqq->next_rq, async_bfqq) <= - bfq_bfqq_budget_left(async_bfqq)) - bfqq = async_bfqq; - else if (bfqq->waker_bfqq && - bfq_bfqq_busy(bfqq->waker_bfqq) && - bfqq->waker_bfqq->next_rq && - bfq_serv_to_charge(bfqq->waker_bfqq->next_rq, - bfqq->waker_bfqq) <= - bfq_bfqq_budget_left(bfqq->waker_bfqq) - ) - bfqq = bfqq->waker_bfqq; - else if (blocked_bfqq && - bfq_bfqq_busy(blocked_bfqq) && - blocked_bfqq->next_rq && - bfq_serv_to_charge(blocked_bfqq->next_rq, - blocked_bfqq) <= - bfq_bfqq_budget_left(blocked_bfqq) - ) - bfqq = blocked_bfqq; - else if (!idling_boosts_thr_without_issues(bfqd, bfqq) && - (bfqq->wr_coeff == 1 || bfqd->wr_busy_queues > 1 || - !bfq_bfqq_has_short_ttime(bfqq))) - bfqq = bfq_choose_bfqq_for_injection(bfqd); - else - bfqq = NULL; - - goto keep_queue; - } - - reason = BFQQE_NO_MORE_REQUESTS; -expire: - bfq_bfqq_expire(bfqd, bfqq, false, reason); -new_queue: - bfqq = bfq_set_in_service_queue(bfqd); - if (bfqq) { - bfq_log_bfqq(bfqd, bfqq, "select_queue: checking new queue"); - goto check_queue; - } -keep_queue: - if (bfqq) - bfq_log_bfqq(bfqd, bfqq, "select_queue: returned this queue"); - else - bfq_log(bfqd, "select_queue: no queue returned"); - - return bfqq; -} - -static void bfq_update_wr_data(struct bfq_data *bfqd, struct bfq_queue *bfqq) -{ - struct bfq_entity *entity = &bfqq->entity; - - if (bfqq->wr_coeff > 1) { /* queue is being weight-raised */ - bfq_log_bfqq(bfqd, bfqq, - "raising period dur %u/%u msec, old coeff %u, w %d(%d)", - jiffies_to_msecs(jiffies - bfqq->last_wr_start_finish), - jiffies_to_msecs(bfqq->wr_cur_max_time), - bfqq->wr_coeff, - bfqq->entity.weight, bfqq->entity.orig_weight); - - if (entity->prio_changed) - bfq_log_bfqq(bfqd, bfqq, "WARN: pending prio change"); - - /* - * If the queue was activated in a burst, or too much - * time has elapsed from the beginning of this - * weight-raising period, then end weight raising. - */ - if (bfq_bfqq_in_large_burst(bfqq)) - bfq_bfqq_end_wr(bfqq); - else if (time_is_before_jiffies(bfqq->last_wr_start_finish + - bfqq->wr_cur_max_time)) { - if (bfqq->wr_cur_max_time != bfqd->bfq_wr_rt_max_time || - time_is_before_jiffies(bfqq->wr_start_at_switch_to_srt + - bfq_wr_duration(bfqd))) { - /* - * Either in interactive weight - * raising, or in soft_rt weight - * raising with the - * interactive-weight-raising period - * elapsed (so no switch back to - * interactive weight raising). - */ - bfq_bfqq_end_wr(bfqq); - } else { /* - * soft_rt finishing while still in - * interactive period, switch back to - * interactive weight raising - */ - switch_back_to_interactive_wr(bfqq, bfqd); - bfqq->entity.prio_changed = 1; - } - } - if (bfqq->wr_coeff > 1 && - bfqq->wr_cur_max_time != bfqd->bfq_wr_rt_max_time && - bfqq->service_from_wr > max_service_from_wr) { - /* see comments on max_service_from_wr */ - bfq_bfqq_end_wr(bfqq); - } - } - /* - * To improve latency (for this or other queues), immediately - * update weight both if it must be raised and if it must be - * lowered. Since, entity may be on some active tree here, and - * might have a pending change of its ioprio class, invoke - * next function with the last parameter unset (see the - * comments on the function). - */ - if ((entity->weight > entity->orig_weight) != (bfqq->wr_coeff > 1)) - __bfq_entity_update_weight_prio(bfq_entity_service_tree(entity), - entity, false); -} - -/* - * Dispatch next request from bfqq. - */ -static struct request *bfq_dispatch_rq_from_bfqq(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - struct request *rq = bfqq->next_rq; - unsigned long service_to_charge; - - service_to_charge = bfq_serv_to_charge(rq, bfqq); - - bfq_bfqq_served(bfqq, service_to_charge); - - if (bfqq == bfqd->in_service_queue && bfqd->wait_dispatch) { - bfqd->wait_dispatch = false; - bfqd->waited_rq = rq; - } - - bfq_dispatch_remove(bfqd->queue, rq); - - if (bfqq != bfqd->in_service_queue) - return rq; - - /* - * If weight raising has to terminate for bfqq, then next - * function causes an immediate update of bfqq's weight, - * without waiting for next activation. As a consequence, on - * expiration, bfqq will be timestamped as if has never been - * weight-raised during this service slot, even if it has - * received part or even most of the service as a - * weight-raised queue. This inflates bfqq's timestamps, which - * is beneficial, as bfqq is then more willing to leave the - * device immediately to possible other weight-raised queues. - */ - bfq_update_wr_data(bfqd, bfqq); - - /* - * Expire bfqq, pretending that its budget expired, if bfqq - * belongs to CLASS_IDLE and other queues are waiting for - * service. - */ - if (bfq_tot_busy_queues(bfqd) > 1 && bfq_class_idle(bfqq)) - bfq_bfqq_expire(bfqd, bfqq, false, BFQQE_BUDGET_EXHAUSTED); - - return rq; -} - -static bool bfq_has_work(struct blk_mq_hw_ctx *hctx) -{ - struct bfq_data *bfqd = hctx->queue->elevator->elevator_data; - - /* - * Avoiding lock: a race on bfqd->queued should cause at - * most a call to dispatch for nothing - */ - return !list_empty_careful(&bfqd->dispatch) || - READ_ONCE(bfqd->queued); -} - -static struct request *__bfq_dispatch_request(struct blk_mq_hw_ctx *hctx) -{ - struct bfq_data *bfqd = hctx->queue->elevator->elevator_data; - struct request *rq = NULL; - struct bfq_queue *bfqq = NULL; - - if (!list_empty(&bfqd->dispatch)) { - rq = list_first_entry(&bfqd->dispatch, struct request, - queuelist); - list_del_init(&rq->queuelist); - - bfqq = RQ_BFQQ(rq); - - if (bfqq) { - /* - * Increment counters here, because this - * dispatch does not follow the standard - * dispatch flow (where counters are - * incremented) - */ - bfqq->dispatched++; - - goto inc_in_driver_start_rq; - } - - /* - * We exploit the bfq_finish_requeue_request hook to - * decrement tot_rq_in_driver, but - * bfq_finish_requeue_request will not be invoked on - * this request. So, to avoid unbalance, just start - * this request, without incrementing tot_rq_in_driver. As - * a negative consequence, tot_rq_in_driver is deceptively - * lower than it should be while this request is in - * service. This may cause bfq_schedule_dispatch to be - * invoked uselessly. - * - * As for implementing an exact solution, the - * bfq_finish_requeue_request hook, if defined, is - * probably invoked also on this request. So, by - * exploiting this hook, we could 1) increment - * tot_rq_in_driver here, and 2) decrement it in - * bfq_finish_requeue_request. Such a solution would - * let the value of the counter be always accurate, - * but it would entail using an extra interface - * function. This cost seems higher than the benefit, - * being the frequency of non-elevator-private - * requests very low. - */ - goto start_rq; - } - - bfq_log(bfqd, "dispatch requests: %d busy queues", - bfq_tot_busy_queues(bfqd)); - - if (bfq_tot_busy_queues(bfqd) == 0) - goto exit; - - /* - * Force device to serve one request at a time if - * strict_guarantees is true. Forcing this service scheme is - * currently the ONLY way to guarantee that the request - * service order enforced by the scheduler is respected by a - * queueing device. Otherwise the device is free even to make - * some unlucky request wait for as long as the device - * wishes. - * - * Of course, serving one request at a time may cause loss of - * throughput. - */ - if (bfqd->strict_guarantees && bfqd->tot_rq_in_driver > 0) - goto exit; - - bfqq = bfq_select_queue(bfqd); - if (!bfqq) - goto exit; - - rq = bfq_dispatch_rq_from_bfqq(bfqd, bfqq); - - if (rq) { -inc_in_driver_start_rq: - bfqd->rq_in_driver[bfqq->actuator_idx]++; - bfqd->tot_rq_in_driver++; -start_rq: - rq->rq_flags |= RQF_STARTED; - } -exit: - return rq; -} - -#ifdef CONFIG_BFQ_CGROUP_DEBUG -static void bfq_update_dispatch_stats(struct request_queue *q, - struct request *rq, - struct bfq_queue *in_serv_queue, - bool idle_timer_disabled) -{ - struct bfq_queue *bfqq = rq ? RQ_BFQQ(rq) : NULL; - - if (!idle_timer_disabled && !bfqq) - return; - - /* - * rq and bfqq are guaranteed to exist until this function - * ends, for the following reasons. First, rq can be - * dispatched to the device, and then can be completed and - * freed, only after this function ends. Second, rq cannot be - * merged (and thus freed because of a merge) any longer, - * because it has already started. Thus rq cannot be freed - * before this function ends, and, since rq has a reference to - * bfqq, the same guarantee holds for bfqq too. - * - * In addition, the following queue lock guarantees that - * bfqq_group(bfqq) exists as well. - */ - spin_lock_irq(&q->queue_lock); - if (idle_timer_disabled) - /* - * Since the idle timer has been disabled, - * in_serv_queue contained some request when - * __bfq_dispatch_request was invoked above, which - * implies that rq was picked exactly from - * in_serv_queue. Thus in_serv_queue == bfqq, and is - * therefore guaranteed to exist because of the above - * arguments. - */ - bfqg_stats_update_idle_time(bfqq_group(in_serv_queue)); - if (bfqq) { - struct bfq_group *bfqg = bfqq_group(bfqq); - - bfqg_stats_update_avg_queue_size(bfqg); - bfqg_stats_set_start_empty_time(bfqg); - bfqg_stats_update_io_remove(bfqg, rq->cmd_flags); - } - spin_unlock_irq(&q->queue_lock); -} -#else -static inline void bfq_update_dispatch_stats(struct request_queue *q, - struct request *rq, - struct bfq_queue *in_serv_queue, - bool idle_timer_disabled) {} -#endif /* CONFIG_BFQ_CGROUP_DEBUG */ - -static struct request *bfq_dispatch_request(struct blk_mq_hw_ctx *hctx) -{ - struct bfq_data *bfqd = hctx->queue->elevator->elevator_data; - struct request *rq; - struct bfq_queue *in_serv_queue; - bool waiting_rq, idle_timer_disabled = false; - - spin_lock_irq(&bfqd->lock); - - in_serv_queue = bfqd->in_service_queue; - waiting_rq = in_serv_queue && bfq_bfqq_wait_request(in_serv_queue); - - rq = __bfq_dispatch_request(hctx); - if (in_serv_queue == bfqd->in_service_queue) { - idle_timer_disabled = - waiting_rq && !bfq_bfqq_wait_request(in_serv_queue); - } - - spin_unlock_irq(&bfqd->lock); - bfq_update_dispatch_stats(hctx->queue, rq, - idle_timer_disabled ? in_serv_queue : NULL, - idle_timer_disabled); - - return rq; -} - -/* - * Task holds one reference to the queue, dropped when task exits. Each rq - * in-flight on this queue also holds a reference, dropped when rq is freed. - * - * Scheduler lock must be held here. Recall not to use bfqq after calling - * this function on it. - */ -void bfq_put_queue(struct bfq_queue *bfqq) -{ - struct bfq_queue *item; - struct hlist_node *n; - struct bfq_group *bfqg = bfqq_group(bfqq); - - bfq_log_bfqq(bfqq->bfqd, bfqq, "put_queue: %p %d", bfqq, bfqq->ref); - - bfqq->ref--; - if (bfqq->ref) - return; - - if (!hlist_unhashed(&bfqq->burst_list_node)) { - hlist_del_init(&bfqq->burst_list_node); - /* - * Decrement also burst size after the removal, if the - * process associated with bfqq is exiting, and thus - * does not contribute to the burst any longer. This - * decrement helps filter out false positives of large - * bursts, when some short-lived process (often due to - * the execution of commands by some service) happens - * to start and exit while a complex application is - * starting, and thus spawning several processes that - * do I/O (and that *must not* be treated as a large - * burst, see comments on bfq_handle_burst). - * - * In particular, the decrement is performed only if: - * 1) bfqq is not a merged queue, because, if it is, - * then this free of bfqq is not triggered by the exit - * of the process bfqq is associated with, but exactly - * by the fact that bfqq has just been merged. - * 2) burst_size is greater than 0, to handle - * unbalanced decrements. Unbalanced decrements may - * happen in te following case: bfqq is inserted into - * the current burst list--without incrementing - * bust_size--because of a split, but the current - * burst list is not the burst list bfqq belonged to - * (see comments on the case of a split in - * bfq_set_request). - */ - if (bfqq->bic && bfqq->bfqd->burst_size > 0) - bfqq->bfqd->burst_size--; - } - - /* - * bfqq does not exist any longer, so it cannot be woken by - * any other queue, and cannot wake any other queue. Then bfqq - * must be removed from the woken list of its possible waker - * queue, and all queues in the woken list of bfqq must stop - * having a waker queue. Strictly speaking, these updates - * should be performed when bfqq remains with no I/O source - * attached to it, which happens before bfqq gets freed. In - * particular, this happens when the last process associated - * with bfqq exits or gets associated with a different - * queue. However, both events lead to bfqq being freed soon, - * and dangling references would come out only after bfqq gets - * freed. So these updates are done here, as a simple and safe - * way to handle all cases. - */ - /* remove bfqq from woken list */ - if (!hlist_unhashed(&bfqq->woken_list_node)) - hlist_del_init(&bfqq->woken_list_node); - - /* reset waker for all queues in woken list */ - hlist_for_each_entry_safe(item, n, &bfqq->woken_list, - woken_list_node) { - item->waker_bfqq = NULL; - hlist_del_init(&item->woken_list_node); - } - - if (bfqq->bfqd->last_completed_rq_bfqq == bfqq) - bfqq->bfqd->last_completed_rq_bfqq = NULL; - - WARN_ON_ONCE(!list_empty(&bfqq->fifo)); - WARN_ON_ONCE(!RB_EMPTY_ROOT(&bfqq->sort_list)); - WARN_ON_ONCE(bfqq->dispatched); - - kmem_cache_free(bfq_pool, bfqq); - bfqg_and_blkg_put(bfqg); -} - -static void bfq_put_stable_ref(struct bfq_queue *bfqq) -{ - bfqq->stable_ref--; - bfq_put_queue(bfqq); -} - -void bfq_put_cooperator(struct bfq_queue *bfqq) -{ - struct bfq_queue *__bfqq, *next; - - /* - * If this queue was scheduled to merge with another queue, be - * sure to drop the reference taken on that queue (and others in - * the merge chain). See bfq_setup_merge and bfq_merge_bfqqs. - */ - __bfqq = bfqq->new_bfqq; - while (__bfqq) { - next = __bfqq->new_bfqq; - bfq_put_queue(__bfqq); - __bfqq = next; - } - - bfq_release_process_ref(bfqq->bfqd, bfqq); -} - -static void bfq_exit_bfqq(struct bfq_data *bfqd, struct bfq_queue *bfqq) -{ - if (bfqq == bfqd->in_service_queue) { - __bfq_bfqq_expire(bfqd, bfqq, BFQQE_BUDGET_TIMEOUT); - bfq_schedule_dispatch(bfqd); - } - - bfq_log_bfqq(bfqd, bfqq, "exit_bfqq: %p, %d", bfqq, bfqq->ref); - - bfq_put_cooperator(bfqq); -} - -static void bfq_exit_icq_bfqq(struct bfq_io_cq *bic, bool is_sync, - unsigned int actuator_idx) -{ - struct bfq_queue *bfqq = bic_to_bfqq(bic, is_sync, actuator_idx); - struct bfq_data *bfqd; - - if (bfqq) - bfqd = bfqq->bfqd; /* NULL if scheduler already exited */ - - if (bfqq && bfqd) { - bic_set_bfqq(bic, NULL, is_sync, actuator_idx); - bfq_exit_bfqq(bfqd, bfqq); - } -} - -static void _bfq_exit_icq(struct bfq_io_cq *bic, unsigned int num_actuators) -{ - struct bfq_iocq_bfqq_data *bfqq_data = bic->bfqq_data; - unsigned int act_idx; - - for (act_idx = 0; act_idx < num_actuators; act_idx++) { - if (bfqq_data[act_idx].stable_merge_bfqq) - bfq_put_stable_ref(bfqq_data[act_idx].stable_merge_bfqq); - - bfq_exit_icq_bfqq(bic, true, act_idx); - bfq_exit_icq_bfqq(bic, false, act_idx); - } -} - -static void bfq_exit_icq(struct io_cq *icq) -{ - struct bfq_io_cq *bic = icq_to_bic(icq); - struct bfq_data *bfqd = bic_to_bfqd(bic); - unsigned long flags; - - /* - * If bfqd and thus bfqd->num_actuators is not available any - * longer, then cycle over all possible per-actuator bfqqs in - * next loop. We rely on bic being zeroed on creation, and - * therefore on its unused per-actuator fields being NULL. - * - * bfqd is NULL if scheduler already exited, and in that case - * this is the last time these queues are accessed. - */ - if (bfqd) { - spin_lock_irqsave(&bfqd->lock, flags); - _bfq_exit_icq(bic, bfqd->num_actuators); - spin_unlock_irqrestore(&bfqd->lock, flags); - } else { - _bfq_exit_icq(bic, BFQ_MAX_ACTUATORS); - } -} - -/* - * Update the entity prio values; note that the new values will not - * be used until the next (re)activation. - */ -static void -bfq_set_next_ioprio_data(struct bfq_queue *bfqq, struct bfq_io_cq *bic) -{ - struct task_struct *tsk = current; - int ioprio_class; - struct bfq_data *bfqd = bfqq->bfqd; - - if (!bfqd) - return; - - ioprio_class = IOPRIO_PRIO_CLASS(bic->ioprio); - switch (ioprio_class) { - default: - pr_err("bdi %s: bfq: bad prio class %d\n", - bdi_dev_name(bfqq->bfqd->queue->disk->bdi), - ioprio_class); - fallthrough; - case IOPRIO_CLASS_NONE: - /* - * No prio set, inherit CPU scheduling settings. - */ - bfqq->new_ioprio = task_nice_ioprio(tsk); - bfqq->new_ioprio_class = task_nice_ioclass(tsk); - break; - case IOPRIO_CLASS_RT: - bfqq->new_ioprio = IOPRIO_PRIO_LEVEL(bic->ioprio); - bfqq->new_ioprio_class = IOPRIO_CLASS_RT; - break; - case IOPRIO_CLASS_BE: - bfqq->new_ioprio = IOPRIO_PRIO_LEVEL(bic->ioprio); - bfqq->new_ioprio_class = IOPRIO_CLASS_BE; - break; - case IOPRIO_CLASS_IDLE: - bfqq->new_ioprio_class = IOPRIO_CLASS_IDLE; - bfqq->new_ioprio = IOPRIO_NR_LEVELS - 1; - break; - } - - if (bfqq->new_ioprio >= IOPRIO_NR_LEVELS) { - pr_crit("bfq_set_next_ioprio_data: new_ioprio %d\n", - bfqq->new_ioprio); - bfqq->new_ioprio = IOPRIO_NR_LEVELS - 1; - } - - bfqq->entity.new_weight = bfq_ioprio_to_weight(bfqq->new_ioprio); - bfq_log_bfqq(bfqd, bfqq, "new_ioprio %d new_weight %d", - bfqq->new_ioprio, bfqq->entity.new_weight); - bfqq->entity.prio_changed = 1; -} - -static struct bfq_queue *bfq_get_queue(struct bfq_data *bfqd, - struct bio *bio, bool is_sync, - struct bfq_io_cq *bic, - bool respawn); - -static void bfq_check_ioprio_change(struct bfq_io_cq *bic, struct bio *bio) -{ - struct bfq_data *bfqd = bic_to_bfqd(bic); - struct bfq_queue *bfqq; - int ioprio = bic->icq.ioc->ioprio; - - /* - * This condition may trigger on a newly created bic, be sure to - * drop the lock before returning. - */ - if (unlikely(!bfqd) || likely(bic->ioprio == ioprio)) - return; - - bic->ioprio = ioprio; - - bfqq = bic_to_bfqq(bic, false, bfq_actuator_index(bfqd, bio)); - if (bfqq) { - struct bfq_queue *old_bfqq = bfqq; - - bfqq = bfq_get_queue(bfqd, bio, false, bic, true); - bic_set_bfqq(bic, bfqq, false, bfq_actuator_index(bfqd, bio)); - bfq_release_process_ref(bfqd, old_bfqq); - } - - bfqq = bic_to_bfqq(bic, true, bfq_actuator_index(bfqd, bio)); - if (bfqq) - bfq_set_next_ioprio_data(bfqq, bic); -} - -static void bfq_init_bfqq(struct bfq_data *bfqd, struct bfq_queue *bfqq, - struct bfq_io_cq *bic, pid_t pid, int is_sync, - unsigned int act_idx) -{ - u64 now_ns = blk_time_get_ns(); - - bfqq->actuator_idx = act_idx; - RB_CLEAR_NODE(&bfqq->entity.rb_node); - INIT_LIST_HEAD(&bfqq->fifo); - INIT_HLIST_NODE(&bfqq->burst_list_node); - INIT_HLIST_NODE(&bfqq->woken_list_node); - INIT_HLIST_HEAD(&bfqq->woken_list); - - bfqq->ref = 0; - bfqq->bfqd = bfqd; - - if (bic) - bfq_set_next_ioprio_data(bfqq, bic); - - if (is_sync) { - /* - * No need to mark as has_short_ttime if in - * idle_class, because no device idling is performed - * for queues in idle class - */ - if (!bfq_class_idle(bfqq)) - /* tentatively mark as has_short_ttime */ - bfq_mark_bfqq_has_short_ttime(bfqq); - bfq_mark_bfqq_sync(bfqq); - bfq_mark_bfqq_just_created(bfqq); - } else - bfq_clear_bfqq_sync(bfqq); - - /* set end request to minus infinity from now */ - bfqq->ttime.last_end_request = now_ns + 1; - - bfqq->creation_time = jiffies; - - bfqq->io_start_time = now_ns; - - bfq_mark_bfqq_IO_bound(bfqq); - - bfqq->pid = pid; - - /* Tentative initial value to trade off between thr and lat */ - bfqq->max_budget = (2 * bfq_max_budget(bfqd)) / 3; - bfqq->budget_timeout = bfq_smallest_from_now(); - - bfqq->wr_coeff = 1; - bfqq->last_wr_start_finish = jiffies; - bfqq->wr_start_at_switch_to_srt = bfq_smallest_from_now(); - bfqq->split_time = bfq_smallest_from_now(); - - /* - * To not forget the possibly high bandwidth consumed by a - * process/queue in the recent past, - * bfq_bfqq_softrt_next_start() returns a value at least equal - * to the current value of bfqq->soft_rt_next_start (see - * comments on bfq_bfqq_softrt_next_start). Set - * soft_rt_next_start to now, to mean that bfqq has consumed - * no bandwidth so far. - */ - bfqq->soft_rt_next_start = jiffies; - - /* first request is almost certainly seeky */ - bfqq->seek_history = 1; - - bfqq->decrease_time_jif = jiffies; -} - -static struct bfq_queue **bfq_async_queue_prio(struct bfq_data *bfqd, - struct bfq_group *bfqg, - int ioprio_class, int ioprio, int act_idx) -{ - switch (ioprio_class) { - case IOPRIO_CLASS_RT: - return &bfqg->async_bfqq[0][ioprio][act_idx]; - case IOPRIO_CLASS_NONE: - ioprio = IOPRIO_BE_NORM; - fallthrough; - case IOPRIO_CLASS_BE: - return &bfqg->async_bfqq[1][ioprio][act_idx]; - case IOPRIO_CLASS_IDLE: - return &bfqg->async_idle_bfqq[act_idx]; - default: - return NULL; - } -} - -static struct bfq_queue * -bfq_do_early_stable_merge(struct bfq_data *bfqd, struct bfq_queue *bfqq, - struct bfq_io_cq *bic, - struct bfq_queue *last_bfqq_created) -{ - unsigned int a_idx = last_bfqq_created->actuator_idx; - struct bfq_queue *new_bfqq = - bfq_setup_merge(bfqq, last_bfqq_created); - - if (!new_bfqq) - return bfqq; - - if (new_bfqq->bic) - new_bfqq->bic->bfqq_data[a_idx].stably_merged = true; - bic->bfqq_data[a_idx].stably_merged = true; - - /* - * Reusing merge functions. This implies that - * bfqq->bic must be set too, for - * bfq_merge_bfqqs to correctly save bfqq's - * state before killing it. - */ - bfqq->bic = bic; - return bfq_merge_bfqqs(bfqd, bic, bfqq); -} - -/* - * Many throughput-sensitive workloads are made of several parallel - * I/O flows, with all flows generated by the same application, or - * more generically by the same task (e.g., system boot). The most - * counterproductive action with these workloads is plugging I/O - * dispatch when one of the bfq_queues associated with these flows - * remains temporarily empty. - * - * To avoid this plugging, BFQ has been using a burst-handling - * mechanism for years now. This mechanism has proven effective for - * throughput, and not detrimental for service guarantees. The - * following function pushes this mechanism a little bit further, - * basing on the following two facts. - * - * First, all the I/O flows of a the same application or task - * contribute to the execution/completion of that common application - * or task. So the performance figures that matter are total - * throughput of the flows and task-wide I/O latency. In particular, - * these flows do not need to be protected from each other, in terms - * of individual bandwidth or latency. - * - * Second, the above fact holds regardless of the number of flows. - * - * Putting these two facts together, this commits merges stably the - * bfq_queues associated with these I/O flows, i.e., with the - * processes that generate these IO/ flows, regardless of how many the - * involved processes are. - * - * To decide whether a set of bfq_queues is actually associated with - * the I/O flows of a common application or task, and to merge these - * queues stably, this function operates as follows: given a bfq_queue, - * say Q2, currently being created, and the last bfq_queue, say Q1, - * created before Q2, Q2 is merged stably with Q1 if - * - very little time has elapsed since when Q1 was created - * - Q2 has the same ioprio as Q1 - * - Q2 belongs to the same group as Q1 - * - * Merging bfq_queues also reduces scheduling overhead. A fio test - * with ten random readers on /dev/nullb shows a throughput boost of - * 40%, with a quadcore. Since BFQ's execution time amounts to ~50% of - * the total per-request processing time, the above throughput boost - * implies that BFQ's overhead is reduced by more than 50%. - * - * This new mechanism most certainly obsoletes the current - * burst-handling heuristics. We keep those heuristics for the moment. - */ -static struct bfq_queue *bfq_do_or_sched_stable_merge(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - struct bfq_io_cq *bic) -{ - struct bfq_queue **source_bfqq = bfqq->entity.parent ? - &bfqq->entity.parent->last_bfqq_created : - &bfqd->last_bfqq_created; - - struct bfq_queue *last_bfqq_created = *source_bfqq; - - /* - * If last_bfqq_created has not been set yet, then init it. If - * it has been set already, but too long ago, then move it - * forward to bfqq. Finally, move also if bfqq belongs to a - * different group than last_bfqq_created, or if bfqq has a - * different ioprio, ioprio_class or actuator_idx. If none of - * these conditions holds true, then try an early stable merge - * or schedule a delayed stable merge. As for the condition on - * actuator_idx, the reason is that, if queues associated with - * different actuators are merged, then control is lost on - * each actuator. Therefore some actuator may be - * underutilized, and throughput may decrease. - * - * A delayed merge is scheduled (instead of performing an - * early merge), in case bfqq might soon prove to be more - * throughput-beneficial if not merged. Currently this is - * possible only if bfqd is rotational with no queueing. For - * such a drive, not merging bfqq is better for throughput if - * bfqq happens to contain sequential I/O. So, we wait a - * little bit for enough I/O to flow through bfqq. After that, - * if such an I/O is sequential, then the merge is - * canceled. Otherwise the merge is finally performed. - */ - if (!last_bfqq_created || - time_before(last_bfqq_created->creation_time + - msecs_to_jiffies(bfq_activation_stable_merging), - bfqq->creation_time) || - bfqq->entity.parent != last_bfqq_created->entity.parent || - bfqq->ioprio != last_bfqq_created->ioprio || - bfqq->ioprio_class != last_bfqq_created->ioprio_class || - bfqq->actuator_idx != last_bfqq_created->actuator_idx) - *source_bfqq = bfqq; - else if (time_after_eq(last_bfqq_created->creation_time + - bfqd->bfq_burst_interval, - bfqq->creation_time)) { - if (likely(bfqd->nonrot_with_queueing)) - /* - * With this type of drive, leaving - * bfqq alone may provide no - * throughput benefits compared with - * merging bfqq. So merge bfqq now. - */ - bfqq = bfq_do_early_stable_merge(bfqd, bfqq, - bic, - last_bfqq_created); - else { /* schedule tentative stable merge */ - /* - * get reference on last_bfqq_created, - * to prevent it from being freed, - * until we decide whether to merge - */ - last_bfqq_created->ref++; - /* - * need to keep track of stable refs, to - * compute process refs correctly - */ - last_bfqq_created->stable_ref++; - /* - * Record the bfqq to merge to. - */ - bic->bfqq_data[last_bfqq_created->actuator_idx].stable_merge_bfqq = - last_bfqq_created; - } - } - - return bfqq; -} - - -static struct bfq_queue *bfq_get_queue(struct bfq_data *bfqd, - struct bio *bio, bool is_sync, - struct bfq_io_cq *bic, - bool respawn) -{ - const int ioprio = IOPRIO_PRIO_LEVEL(bic->ioprio); - const int ioprio_class = IOPRIO_PRIO_CLASS(bic->ioprio); - struct bfq_queue **async_bfqq = NULL; - struct bfq_queue *bfqq; - struct bfq_group *bfqg; - - bfqg = bfq_bio_bfqg(bfqd, bio); - if (!is_sync) { - async_bfqq = bfq_async_queue_prio(bfqd, bfqg, ioprio_class, - ioprio, - bfq_actuator_index(bfqd, bio)); - bfqq = *async_bfqq; - if (bfqq) - goto out; - } - - bfqq = kmem_cache_alloc_node(bfq_pool, - GFP_NOWAIT | __GFP_ZERO | __GFP_NOWARN, - bfqd->queue->node); - - if (bfqq) { - bfq_init_bfqq(bfqd, bfqq, bic, current->pid, - is_sync, bfq_actuator_index(bfqd, bio)); - bfq_init_entity(&bfqq->entity, bfqg); - bfq_log_bfqq(bfqd, bfqq, "allocated"); - } else { - bfqq = &bfqd->oom_bfqq; - bfq_log_bfqq(bfqd, bfqq, "using oom bfqq"); - goto out; - } - - /* - * Pin the queue now that it's allocated, scheduler exit will - * prune it. - */ - if (async_bfqq) { - bfqq->ref++; /* - * Extra group reference, w.r.t. sync - * queue. This extra reference is removed - * only if bfqq->bfqg disappears, to - * guarantee that this queue is not freed - * until its group goes away. - */ - bfq_log_bfqq(bfqd, bfqq, "get_queue, bfqq not in async: %p, %d", - bfqq, bfqq->ref); - *async_bfqq = bfqq; - } - -out: - bfqq->ref++; /* get a process reference to this queue */ - - if (bfqq != &bfqd->oom_bfqq && is_sync && !respawn) - bfqq = bfq_do_or_sched_stable_merge(bfqd, bfqq, bic); - return bfqq; -} - -static void bfq_update_io_thinktime(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - struct bfq_ttime *ttime = &bfqq->ttime; - u64 elapsed; - - /* - * We are really interested in how long it takes for the queue to - * become busy when there is no outstanding IO for this queue. So - * ignore cases when the bfq queue has already IO queued. - */ - if (bfqq->dispatched || bfq_bfqq_busy(bfqq)) - return; - elapsed = blk_time_get_ns() - bfqq->ttime.last_end_request; - elapsed = min_t(u64, elapsed, 2ULL * bfqd->bfq_slice_idle); - - ttime->ttime_samples = (7*ttime->ttime_samples + 256) / 8; - ttime->ttime_total = div_u64(7*ttime->ttime_total + 256*elapsed, 8); - ttime->ttime_mean = div64_ul(ttime->ttime_total + 128, - ttime->ttime_samples); -} - -static void -bfq_update_io_seektime(struct bfq_data *bfqd, struct bfq_queue *bfqq, - struct request *rq) -{ - bfqq->seek_history <<= 1; - bfqq->seek_history |= BFQ_RQ_SEEKY(bfqd, bfqq->last_request_pos, rq); - - if (bfqq->wr_coeff > 1 && - bfqq->wr_cur_max_time == bfqd->bfq_wr_rt_max_time && - BFQQ_TOTALLY_SEEKY(bfqq)) { - if (time_is_before_jiffies(bfqq->wr_start_at_switch_to_srt + - bfq_wr_duration(bfqd))) { - /* - * In soft_rt weight raising with the - * interactive-weight-raising period - * elapsed (so no switch back to - * interactive weight raising). - */ - bfq_bfqq_end_wr(bfqq); - } else { /* - * stopping soft_rt weight raising - * while still in interactive period, - * switch back to interactive weight - * raising - */ - switch_back_to_interactive_wr(bfqq, bfqd); - bfqq->entity.prio_changed = 1; - } - } -} - -static void bfq_update_has_short_ttime(struct bfq_data *bfqd, - struct bfq_queue *bfqq, - struct bfq_io_cq *bic) -{ - bool has_short_ttime = true, state_changed; - - /* - * No need to update has_short_ttime if bfqq is async or in - * idle io prio class, or if bfq_slice_idle is zero, because - * no device idling is performed for bfqq in this case. - */ - if (!bfq_bfqq_sync(bfqq) || bfq_class_idle(bfqq) || - bfqd->bfq_slice_idle == 0) - return; - - /* Idle window just restored, statistics are meaningless. */ - if (time_is_after_eq_jiffies(bfqq->split_time + - bfqd->bfq_wr_min_idle_time)) - return; - - /* Think time is infinite if no process is linked to - * bfqq. Otherwise check average think time to decide whether - * to mark as has_short_ttime. To this goal, compare average - * think time with half the I/O-plugging timeout. - */ - if (atomic_read(&bic->icq.ioc->active_ref) == 0 || - (bfq_sample_valid(bfqq->ttime.ttime_samples) && - bfqq->ttime.ttime_mean > bfqd->bfq_slice_idle>>1)) - has_short_ttime = false; - - state_changed = has_short_ttime != bfq_bfqq_has_short_ttime(bfqq); - - if (has_short_ttime) - bfq_mark_bfqq_has_short_ttime(bfqq); - else - bfq_clear_bfqq_has_short_ttime(bfqq); - - /* - * Until the base value for the total service time gets - * finally computed for bfqq, the inject limit does depend on - * the think-time state (short|long). In particular, the limit - * is 0 or 1 if the think time is deemed, respectively, as - * short or long (details in the comments in - * bfq_update_inject_limit()). Accordingly, the next - * instructions reset the inject limit if the think-time state - * has changed and the above base value is still to be - * computed. - * - * However, the reset is performed only if more than 100 ms - * have elapsed since the last update of the inject limit, or - * (inclusive) if the change is from short to long think - * time. The reason for this waiting is as follows. - * - * bfqq may have a long think time because of a - * synchronization with some other queue, i.e., because the - * I/O of some other queue may need to be completed for bfqq - * to receive new I/O. Details in the comments on the choice - * of the queue for injection in bfq_select_queue(). - * - * As stressed in those comments, if such a synchronization is - * actually in place, then, without injection on bfqq, the - * blocking I/O cannot happen to served while bfqq is in - * service. As a consequence, if bfqq is granted - * I/O-dispatch-plugging, then bfqq remains empty, and no I/O - * is dispatched, until the idle timeout fires. This is likely - * to result in lower bandwidth and higher latencies for bfqq, - * and in a severe loss of total throughput. - * - * On the opposite end, a non-zero inject limit may allow the - * I/O that blocks bfqq to be executed soon, and therefore - * bfqq to receive new I/O soon. - * - * But, if the blocking gets actually eliminated, then the - * next think-time sample for bfqq may be very low. This in - * turn may cause bfqq's think time to be deemed - * short. Without the 100 ms barrier, this new state change - * would cause the body of the next if to be executed - * immediately. But this would set to 0 the inject - * limit. Without injection, the blocking I/O would cause the - * think time of bfqq to become long again, and therefore the - * inject limit to be raised again, and so on. The only effect - * of such a steady oscillation between the two think-time - * states would be to prevent effective injection on bfqq. - * - * In contrast, if the inject limit is not reset during such a - * long time interval as 100 ms, then the number of short - * think time samples can grow significantly before the reset - * is performed. As a consequence, the think time state can - * become stable before the reset. Therefore there will be no - * state change when the 100 ms elapse, and no reset of the - * inject limit. The inject limit remains steadily equal to 1 - * both during and after the 100 ms. So injection can be - * performed at all times, and throughput gets boosted. - * - * An inject limit equal to 1 is however in conflict, in - * general, with the fact that the think time of bfqq is - * short, because injection may be likely to delay bfqq's I/O - * (as explained in the comments in - * bfq_update_inject_limit()). But this does not happen in - * this special case, because bfqq's low think time is due to - * an effective handling of a synchronization, through - * injection. In this special case, bfqq's I/O does not get - * delayed by injection; on the contrary, bfqq's I/O is - * brought forward, because it is not blocked for - * milliseconds. - * - * In addition, serving the blocking I/O much sooner, and much - * more frequently than once per I/O-plugging timeout, makes - * it much quicker to detect a waker queue (the concept of - * waker queue is defined in the comments in - * bfq_add_request()). This makes it possible to start sooner - * to boost throughput more effectively, by injecting the I/O - * of the waker queue unconditionally on every - * bfq_dispatch_request(). - * - * One last, important benefit of not resetting the inject - * limit before 100 ms is that, during this time interval, the - * base value for the total service time is likely to get - * finally computed for bfqq, freeing the inject limit from - * its relation with the think time. - */ - if (state_changed && bfqq->last_serv_time_ns == 0 && - (time_is_before_eq_jiffies(bfqq->decrease_time_jif + - msecs_to_jiffies(100)) || - !has_short_ttime)) - bfq_reset_inject_limit(bfqd, bfqq); -} - -/* - * Called when a new fs request (rq) is added to bfqq. Check if there's - * something we should do about it. - */ -static void bfq_rq_enqueued(struct bfq_data *bfqd, struct bfq_queue *bfqq, - struct request *rq) -{ - if (rq->cmd_flags & REQ_META) - bfqq->meta_pending++; - - bfqq->last_request_pos = blk_rq_pos(rq) + blk_rq_sectors(rq); - - if (bfqq == bfqd->in_service_queue && bfq_bfqq_wait_request(bfqq)) { - bool small_req = bfqq->queued[rq_is_sync(rq)] == 1 && - blk_rq_sectors(rq) < 32; - bool budget_timeout = bfq_bfqq_budget_timeout(bfqq); - - /* - * There is just this request queued: if - * - the request is small, and - * - we are idling to boost throughput, and - * - the queue is not to be expired, - * then just exit. - * - * In this way, if the device is being idled to wait - * for a new request from the in-service queue, we - * avoid unplugging the device and committing the - * device to serve just a small request. In contrast - * we wait for the block layer to decide when to - * unplug the device: hopefully, new requests will be - * merged to this one quickly, then the device will be - * unplugged and larger requests will be dispatched. - */ - if (small_req && idling_boosts_thr_without_issues(bfqd, bfqq) && - !budget_timeout) - return; - - /* - * A large enough request arrived, or idling is being - * performed to preserve service guarantees, or - * finally the queue is to be expired: in all these - * cases disk idling is to be stopped, so clear - * wait_request flag and reset timer. - */ - bfq_clear_bfqq_wait_request(bfqq); - hrtimer_try_to_cancel(&bfqd->idle_slice_timer); - - /* - * The queue is not empty, because a new request just - * arrived. Hence we can safely expire the queue, in - * case of budget timeout, without risking that the - * timestamps of the queue are not updated correctly. - * See [1] for more details. - */ - if (budget_timeout) - bfq_bfqq_expire(bfqd, bfqq, false, - BFQQE_BUDGET_TIMEOUT); - } -} - -static void bfqq_request_allocated(struct bfq_queue *bfqq) -{ - struct bfq_entity *entity = &bfqq->entity; - - for_each_entity(entity) - entity->allocated++; -} - -static void bfqq_request_freed(struct bfq_queue *bfqq) -{ - struct bfq_entity *entity = &bfqq->entity; - - for_each_entity(entity) - entity->allocated--; -} - -/* returns true if it causes the idle timer to be disabled */ -static bool __bfq_insert_request(struct bfq_data *bfqd, struct request *rq) -{ - struct bfq_queue *bfqq = RQ_BFQQ(rq), - *new_bfqq = bfq_setup_cooperator(bfqd, bfqq, rq, true, - RQ_BIC(rq)); - bool waiting, idle_timer_disabled = false; - - if (new_bfqq) { - struct bfq_queue *old_bfqq = bfqq; - /* - * Release the request's reference to the old bfqq - * and make sure one is taken to the shared queue. - */ - bfqq_request_allocated(new_bfqq); - bfqq_request_freed(bfqq); - new_bfqq->ref++; - /* - * If the bic associated with the process - * issuing this request still points to bfqq - * (and thus has not been already redirected - * to new_bfqq or even some other bfq_queue), - * then complete the merge and redirect it to - * new_bfqq. - */ - if (bic_to_bfqq(RQ_BIC(rq), true, - bfq_actuator_index(bfqd, rq->bio)) == bfqq) { - while (bfqq != new_bfqq) - bfqq = bfq_merge_bfqqs(bfqd, RQ_BIC(rq), bfqq); - } - - bfq_clear_bfqq_just_created(old_bfqq); - /* - * rq is about to be enqueued into new_bfqq, - * release rq reference on bfqq - */ - bfq_put_queue(old_bfqq); - rq->elv.priv[1] = new_bfqq; - } - - bfq_update_io_thinktime(bfqd, bfqq); - bfq_update_has_short_ttime(bfqd, bfqq, RQ_BIC(rq)); - bfq_update_io_seektime(bfqd, bfqq, rq); - - waiting = bfqq && bfq_bfqq_wait_request(bfqq); - bfq_add_request(rq); - idle_timer_disabled = waiting && !bfq_bfqq_wait_request(bfqq); - - rq->fifo_time = blk_time_get_ns() + bfqd->bfq_fifo_expire[rq_is_sync(rq)]; - list_add_tail(&rq->queuelist, &bfqq->fifo); - - bfq_rq_enqueued(bfqd, bfqq, rq); - - return idle_timer_disabled; -} - -#ifdef CONFIG_BFQ_CGROUP_DEBUG -static void bfq_update_insert_stats(struct request_queue *q, - struct bfq_queue *bfqq, - bool idle_timer_disabled, - blk_opf_t cmd_flags) -{ - if (!bfqq) - return; - - /* - * bfqq still exists, because it can disappear only after - * either it is merged with another queue, or the process it - * is associated with exits. But both actions must be taken by - * the same process currently executing this flow of - * instructions. - * - * In addition, the following queue lock guarantees that - * bfqq_group(bfqq) exists as well. - */ - spin_lock_irq(&q->queue_lock); - bfqg_stats_update_io_add(bfqq_group(bfqq), bfqq, cmd_flags); - if (idle_timer_disabled) - bfqg_stats_update_idle_time(bfqq_group(bfqq)); - spin_unlock_irq(&q->queue_lock); -} -#else -static inline void bfq_update_insert_stats(struct request_queue *q, - struct bfq_queue *bfqq, - bool idle_timer_disabled, - blk_opf_t cmd_flags) {} -#endif /* CONFIG_BFQ_CGROUP_DEBUG */ - -static struct bfq_queue *bfq_init_rq(struct request *rq); - -static void bfq_insert_request(struct blk_mq_hw_ctx *hctx, struct request *rq, - blk_insert_t flags) -{ - struct request_queue *q = hctx->queue; - struct bfq_data *bfqd = q->elevator->elevator_data; - struct bfq_queue *bfqq; - bool idle_timer_disabled = false; - blk_opf_t cmd_flags; - LIST_HEAD(free); - -#ifdef CONFIG_BFQ_GROUP_IOSCHED - if (!cgroup_subsys_on_dfl(io_cgrp_subsys) && rq->bio) - bfqg_stats_update_legacy_io(q, rq); -#endif - spin_lock_irq(&bfqd->lock); - bfqq = bfq_init_rq(rq); - if (blk_mq_sched_try_insert_merge(q, rq, &free)) { - spin_unlock_irq(&bfqd->lock); - blk_mq_free_requests(&free); - return; - } - - trace_block_rq_insert(rq); - - if (flags & BLK_MQ_INSERT_AT_HEAD) { - list_add(&rq->queuelist, &bfqd->dispatch); - } else if (!bfqq) { - list_add_tail(&rq->queuelist, &bfqd->dispatch); - } else { - idle_timer_disabled = __bfq_insert_request(bfqd, rq); - /* - * Update bfqq, because, if a queue merge has occurred - * in __bfq_insert_request, then rq has been - * redirected into a new queue. - */ - bfqq = RQ_BFQQ(rq); - - if (rq_mergeable(rq)) { - elv_rqhash_add(q, rq); - if (!q->last_merge) - q->last_merge = rq; - } - } - - /* - * Cache cmd_flags before releasing scheduler lock, because rq - * may disappear afterwards (for example, because of a request - * merge). - */ - cmd_flags = rq->cmd_flags; - spin_unlock_irq(&bfqd->lock); - - bfq_update_insert_stats(q, bfqq, idle_timer_disabled, - cmd_flags); -} - -static void bfq_insert_requests(struct blk_mq_hw_ctx *hctx, - struct list_head *list, - blk_insert_t flags) -{ - while (!list_empty(list)) { - struct request *rq; - - rq = list_first_entry(list, struct request, queuelist); - list_del_init(&rq->queuelist); - bfq_insert_request(hctx, rq, flags); - } -} - -static void bfq_update_hw_tag(struct bfq_data *bfqd) -{ - struct bfq_queue *bfqq = bfqd->in_service_queue; - - bfqd->max_rq_in_driver = max_t(int, bfqd->max_rq_in_driver, - bfqd->tot_rq_in_driver); - - if (bfqd->hw_tag == 1) - return; - - /* - * This sample is valid if the number of outstanding requests - * is large enough to allow a queueing behavior. Note that the - * sum is not exact, as it's not taking into account deactivated - * requests. - */ - if (bfqd->tot_rq_in_driver + bfqd->queued <= BFQ_HW_QUEUE_THRESHOLD) - return; - - /* - * If active queue hasn't enough requests and can idle, bfq might not - * dispatch sufficient requests to hardware. Don't zero hw_tag in this - * case - */ - if (bfqq && bfq_bfqq_has_short_ttime(bfqq) && - bfqq->dispatched + bfqq->queued[0] + bfqq->queued[1] < - BFQ_HW_QUEUE_THRESHOLD && - bfqd->tot_rq_in_driver < BFQ_HW_QUEUE_THRESHOLD) - return; - - if (bfqd->hw_tag_samples++ < BFQ_HW_QUEUE_SAMPLES) - return; - - bfqd->hw_tag = bfqd->max_rq_in_driver > BFQ_HW_QUEUE_THRESHOLD; - bfqd->max_rq_in_driver = 0; - bfqd->hw_tag_samples = 0; - - bfqd->nonrot_with_queueing = - blk_queue_nonrot(bfqd->queue) && bfqd->hw_tag; -} - -static void bfq_completed_request(struct bfq_queue *bfqq, struct bfq_data *bfqd) -{ - u64 now_ns; - u32 delta_us; - - bfq_update_hw_tag(bfqd); - - bfqd->rq_in_driver[bfqq->actuator_idx]--; - bfqd->tot_rq_in_driver--; - bfqq->dispatched--; - - if (!bfqq->dispatched && !bfq_bfqq_busy(bfqq)) { - /* - * Set budget_timeout (which we overload to store the - * time at which the queue remains with no backlog and - * no outstanding request; used by the weight-raising - * mechanism). - */ - bfqq->budget_timeout = jiffies; - - bfq_del_bfqq_in_groups_with_pending_reqs(bfqq); - bfq_weights_tree_remove(bfqq); - } - - now_ns = blk_time_get_ns(); - - bfqq->ttime.last_end_request = now_ns; - - /* - * Using us instead of ns, to get a reasonable precision in - * computing rate in next check. - */ - delta_us = div_u64(now_ns - bfqd->last_completion, NSEC_PER_USEC); - - /* - * If the request took rather long to complete, and, according - * to the maximum request size recorded, this completion latency - * implies that the request was certainly served at a very low - * rate (less than 1M sectors/sec), then the whole observation - * interval that lasts up to this time instant cannot be a - * valid time interval for computing a new peak rate. Invoke - * bfq_update_rate_reset to have the following three steps - * taken: - * - close the observation interval at the last (previous) - * request dispatch or completion - * - compute rate, if possible, for that observation interval - * - reset to zero samples, which will trigger a proper - * re-initialization of the observation interval on next - * dispatch - */ - if (delta_us > BFQ_MIN_TT/NSEC_PER_USEC && - (bfqd->last_rq_max_size<last_completion = now_ns; - /* - * Shared queues are likely to receive I/O at a high - * rate. This may deceptively let them be considered as wakers - * of other queues. But a false waker will unjustly steal - * bandwidth to its supposedly woken queue. So considering - * also shared queues in the waking mechanism may cause more - * control troubles than throughput benefits. Then reset - * last_completed_rq_bfqq if bfqq is a shared queue. - */ - if (!bfq_bfqq_coop(bfqq)) - bfqd->last_completed_rq_bfqq = bfqq; - else - bfqd->last_completed_rq_bfqq = NULL; - - /* - * If we are waiting to discover whether the request pattern - * of the task associated with the queue is actually - * isochronous, and both requisites for this condition to hold - * are now satisfied, then compute soft_rt_next_start (see the - * comments on the function bfq_bfqq_softrt_next_start()). We - * do not compute soft_rt_next_start if bfqq is in interactive - * weight raising (see the comments in bfq_bfqq_expire() for - * an explanation). We schedule this delayed update when bfqq - * expires, if it still has in-flight requests. - */ - if (bfq_bfqq_softrt_update(bfqq) && bfqq->dispatched == 0 && - RB_EMPTY_ROOT(&bfqq->sort_list) && - bfqq->wr_coeff != bfqd->bfq_wr_coeff) - bfqq->soft_rt_next_start = - bfq_bfqq_softrt_next_start(bfqd, bfqq); - - /* - * If this is the in-service queue, check if it needs to be expired, - * or if we want to idle in case it has no pending requests. - */ - if (bfqd->in_service_queue == bfqq) { - if (bfq_bfqq_must_idle(bfqq)) { - if (bfqq->dispatched == 0) - bfq_arm_slice_timer(bfqd); - /* - * If we get here, we do not expire bfqq, even - * if bfqq was in budget timeout or had no - * more requests (as controlled in the next - * conditional instructions). The reason for - * not expiring bfqq is as follows. - * - * Here bfqq->dispatched > 0 holds, but - * bfq_bfqq_must_idle() returned true. This - * implies that, even if no request arrives - * for bfqq before bfqq->dispatched reaches 0, - * bfqq will, however, not be expired on the - * completion event that causes bfqq->dispatch - * to reach zero. In contrast, on this event, - * bfqq will start enjoying device idling - * (I/O-dispatch plugging). - * - * But, if we expired bfqq here, bfqq would - * not have the chance to enjoy device idling - * when bfqq->dispatched finally reaches - * zero. This would expose bfqq to violation - * of its reserved service guarantees. - */ - return; - } else if (bfq_may_expire_for_budg_timeout(bfqq)) - bfq_bfqq_expire(bfqd, bfqq, false, - BFQQE_BUDGET_TIMEOUT); - else if (RB_EMPTY_ROOT(&bfqq->sort_list) && - (bfqq->dispatched == 0 || - !bfq_better_to_idle(bfqq))) - bfq_bfqq_expire(bfqd, bfqq, false, - BFQQE_NO_MORE_REQUESTS); - } - - if (!bfqd->tot_rq_in_driver) - bfq_schedule_dispatch(bfqd); -} - -/* - * The processes associated with bfqq may happen to generate their - * cumulative I/O at a lower rate than the rate at which the device - * could serve the same I/O. This is rather probable, e.g., if only - * one process is associated with bfqq and the device is an SSD. It - * results in bfqq becoming often empty while in service. In this - * respect, if BFQ is allowed to switch to another queue when bfqq - * remains empty, then the device goes on being fed with I/O requests, - * and the throughput is not affected. In contrast, if BFQ is not - * allowed to switch to another queue---because bfqq is sync and - * I/O-dispatch needs to be plugged while bfqq is temporarily - * empty---then, during the service of bfqq, there will be frequent - * "service holes", i.e., time intervals during which bfqq gets empty - * and the device can only consume the I/O already queued in its - * hardware queues. During service holes, the device may even get to - * remaining idle. In the end, during the service of bfqq, the device - * is driven at a lower speed than the one it can reach with the kind - * of I/O flowing through bfqq. - * - * To counter this loss of throughput, BFQ implements a "request - * injection mechanism", which tries to fill the above service holes - * with I/O requests taken from other queues. The hard part in this - * mechanism is finding the right amount of I/O to inject, so as to - * both boost throughput and not break bfqq's bandwidth and latency - * guarantees. In this respect, the mechanism maintains a per-queue - * inject limit, computed as below. While bfqq is empty, the injection - * mechanism dispatches extra I/O requests only until the total number - * of I/O requests in flight---i.e., already dispatched but not yet - * completed---remains lower than this limit. - * - * A first definition comes in handy to introduce the algorithm by - * which the inject limit is computed. We define as first request for - * bfqq, an I/O request for bfqq that arrives while bfqq is in - * service, and causes bfqq to switch from empty to non-empty. The - * algorithm updates the limit as a function of the effect of - * injection on the service times of only the first requests of - * bfqq. The reason for this restriction is that these are the - * requests whose service time is affected most, because they are the - * first to arrive after injection possibly occurred. - * - * To evaluate the effect of injection, the algorithm measures the - * "total service time" of first requests. We define as total service - * time of an I/O request, the time that elapses since when the - * request is enqueued into bfqq, to when it is completed. This - * quantity allows the whole effect of injection to be measured. It is - * easy to see why. Suppose that some requests of other queues are - * actually injected while bfqq is empty, and that a new request R - * then arrives for bfqq. If the device does start to serve all or - * part of the injected requests during the service hole, then, - * because of this extra service, it may delay the next invocation of - * the dispatch hook of BFQ. Then, even after R gets eventually - * dispatched, the device may delay the actual service of R if it is - * still busy serving the extra requests, or if it decides to serve, - * before R, some extra request still present in its queues. As a - * conclusion, the cumulative extra delay caused by injection can be - * easily evaluated by just comparing the total service time of first - * requests with and without injection. - * - * The limit-update algorithm works as follows. On the arrival of a - * first request of bfqq, the algorithm measures the total time of the - * request only if one of the three cases below holds, and, for each - * case, it updates the limit as described below: - * - * (1) If there is no in-flight request. This gives a baseline for the - * total service time of the requests of bfqq. If the baseline has - * not been computed yet, then, after computing it, the limit is - * set to 1, to start boosting throughput, and to prepare the - * ground for the next case. If the baseline has already been - * computed, then it is updated, in case it results to be lower - * than the previous value. - * - * (2) If the limit is higher than 0 and there are in-flight - * requests. By comparing the total service time in this case with - * the above baseline, it is possible to know at which extent the - * current value of the limit is inflating the total service - * time. If the inflation is below a certain threshold, then bfqq - * is assumed to be suffering from no perceivable loss of its - * service guarantees, and the limit is even tentatively - * increased. If the inflation is above the threshold, then the - * limit is decreased. Due to the lack of any hysteresis, this - * logic makes the limit oscillate even in steady workload - * conditions. Yet we opted for it, because it is fast in reaching - * the best value for the limit, as a function of the current I/O - * workload. To reduce oscillations, this step is disabled for a - * short time interval after the limit happens to be decreased. - * - * (3) Periodically, after resetting the limit, to make sure that the - * limit eventually drops in case the workload changes. This is - * needed because, after the limit has gone safely up for a - * certain workload, it is impossible to guess whether the - * baseline total service time may have changed, without measuring - * it again without injection. A more effective version of this - * step might be to just sample the baseline, by interrupting - * injection only once, and then to reset/lower the limit only if - * the total service time with the current limit does happen to be - * too large. - * - * More details on each step are provided in the comments on the - * pieces of code that implement these steps: the branch handling the - * transition from empty to non empty in bfq_add_request(), the branch - * handling injection in bfq_select_queue(), and the function - * bfq_choose_bfqq_for_injection(). These comments also explain some - * exceptions, made by the injection mechanism in some special cases. - */ -static void bfq_update_inject_limit(struct bfq_data *bfqd, - struct bfq_queue *bfqq) -{ - u64 tot_time_ns = blk_time_get_ns() - bfqd->last_empty_occupied_ns; - unsigned int old_limit = bfqq->inject_limit; - - if (bfqq->last_serv_time_ns > 0 && bfqd->rqs_injected) { - u64 threshold = (bfqq->last_serv_time_ns * 3)>>1; - - if (tot_time_ns >= threshold && old_limit > 0) { - bfqq->inject_limit--; - bfqq->decrease_time_jif = jiffies; - } else if (tot_time_ns < threshold && - old_limit <= bfqd->max_rq_in_driver) - bfqq->inject_limit++; - } - - /* - * Either we still have to compute the base value for the - * total service time, and there seem to be the right - * conditions to do it, or we can lower the last base value - * computed. - * - * NOTE: (bfqd->tot_rq_in_driver == 1) means that there is no I/O - * request in flight, because this function is in the code - * path that handles the completion of a request of bfqq, and, - * in particular, this function is executed before - * bfqd->tot_rq_in_driver is decremented in such a code path. - */ - if ((bfqq->last_serv_time_ns == 0 && bfqd->tot_rq_in_driver == 1) || - tot_time_ns < bfqq->last_serv_time_ns) { - if (bfqq->last_serv_time_ns == 0) { - /* - * Now we certainly have a base value: make sure we - * start trying injection. - */ - bfqq->inject_limit = max_t(unsigned int, 1, old_limit); - } - bfqq->last_serv_time_ns = tot_time_ns; - } else if (!bfqd->rqs_injected && bfqd->tot_rq_in_driver == 1) - /* - * No I/O injected and no request still in service in - * the drive: these are the exact conditions for - * computing the base value of the total service time - * for bfqq. So let's update this value, because it is - * rather variable. For example, it varies if the size - * or the spatial locality of the I/O requests in bfqq - * change. - */ - bfqq->last_serv_time_ns = tot_time_ns; - - - /* update complete, not waiting for any request completion any longer */ - bfqd->waited_rq = NULL; - bfqd->rqs_injected = false; -} - -/* - * Handle either a requeue or a finish for rq. The things to do are - * the same in both cases: all references to rq are to be dropped. In - * particular, rq is considered completed from the point of view of - * the scheduler. - */ -static void bfq_finish_requeue_request(struct request *rq) -{ - struct bfq_queue *bfqq = RQ_BFQQ(rq); - struct bfq_data *bfqd; - unsigned long flags; - - /* - * rq either is not associated with any icq, or is an already - * requeued request that has not (yet) been re-inserted into - * a bfq_queue. - */ - if (!rq->elv.icq || !bfqq) - return; - - bfqd = bfqq->bfqd; - - if (rq->rq_flags & RQF_STARTED) - bfqg_stats_update_completion(bfqq_group(bfqq), - rq->start_time_ns, - rq->io_start_time_ns, - rq->cmd_flags); - - spin_lock_irqsave(&bfqd->lock, flags); - if (likely(rq->rq_flags & RQF_STARTED)) { - if (rq == bfqd->waited_rq) - bfq_update_inject_limit(bfqd, bfqq); - - bfq_completed_request(bfqq, bfqd); - } - bfqq_request_freed(bfqq); - bfq_put_queue(bfqq); - RQ_BIC(rq)->requests--; - spin_unlock_irqrestore(&bfqd->lock, flags); - - /* - * Reset private fields. In case of a requeue, this allows - * this function to correctly do nothing if it is spuriously - * invoked again on this same request (see the check at the - * beginning of the function). Probably, a better general - * design would be to prevent blk-mq from invoking the requeue - * or finish hooks of an elevator, for a request that is not - * referred by that elevator. - * - * Resetting the following fields would break the - * request-insertion logic if rq is re-inserted into a bfq - * internal queue, without a re-preparation. Here we assume - * that re-insertions of requeued requests, without - * re-preparation, can happen only for pass_through or at_head - * requests (which are not re-inserted into bfq internal - * queues). - */ - rq->elv.priv[0] = NULL; - rq->elv.priv[1] = NULL; -} - -static void bfq_finish_request(struct request *rq) -{ - bfq_finish_requeue_request(rq); - - if (rq->elv.icq) { - put_io_context(rq->elv.icq->ioc); - rq->elv.icq = NULL; - } -} - -/* - * Removes the association between the current task and bfqq, assuming - * that bic points to the bfq iocontext of the task. - * Returns NULL if a new bfqq should be allocated, or the old bfqq if this - * was the last process referring to that bfqq. - */ -static struct bfq_queue * -bfq_split_bfqq(struct bfq_io_cq *bic, struct bfq_queue *bfqq) -{ - bfq_log_bfqq(bfqq->bfqd, bfqq, "splitting queue"); - - if (bfqq_process_refs(bfqq) == 1 && !bfqq->new_bfqq) { - bfqq->pid = current->pid; - bfq_clear_bfqq_coop(bfqq); - bfq_clear_bfqq_split_coop(bfqq); - return bfqq; - } - - bic_set_bfqq(bic, NULL, true, bfqq->actuator_idx); - - bfq_put_cooperator(bfqq); - return NULL; -} - -static struct bfq_queue * -__bfq_get_bfqq_handle_split(struct bfq_data *bfqd, struct bfq_io_cq *bic, - struct bio *bio, bool split, bool is_sync, - bool *new_queue) -{ - unsigned int act_idx = bfq_actuator_index(bfqd, bio); - struct bfq_queue *bfqq = bic_to_bfqq(bic, is_sync, act_idx); - struct bfq_iocq_bfqq_data *bfqq_data = &bic->bfqq_data[act_idx]; - - if (likely(bfqq && bfqq != &bfqd->oom_bfqq)) - return bfqq; - - if (new_queue) - *new_queue = true; - - if (bfqq) - bfq_put_queue(bfqq); - bfqq = bfq_get_queue(bfqd, bio, is_sync, bic, split); - - bic_set_bfqq(bic, bfqq, is_sync, act_idx); - if (split && is_sync) { - if ((bfqq_data->was_in_burst_list && bfqd->large_burst) || - bfqq_data->saved_in_large_burst) - bfq_mark_bfqq_in_large_burst(bfqq); - else { - bfq_clear_bfqq_in_large_burst(bfqq); - if (bfqq_data->was_in_burst_list) - /* - * If bfqq was in the current - * burst list before being - * merged, then we have to add - * it back. And we do not need - * to increase burst_size, as - * we did not decrement - * burst_size when we removed - * bfqq from the burst list as - * a consequence of a merge - * (see comments in - * bfq_put_queue). In this - * respect, it would be rather - * costly to know whether the - * current burst list is still - * the same burst list from - * which bfqq was removed on - * the merge. To avoid this - * cost, if bfqq was in a - * burst list, then we add - * bfqq to the current burst - * list without any further - * check. This can cause - * inappropriate insertions, - * but rarely enough to not - * harm the detection of large - * bursts significantly. - */ - hlist_add_head(&bfqq->burst_list_node, - &bfqd->burst_list); - } - bfqq->split_time = jiffies; - } - - return bfqq; -} - -/* - * Only reset private fields. The actual request preparation will be - * performed by bfq_init_rq, when rq is either inserted or merged. See - * comments on bfq_init_rq for the reason behind this delayed - * preparation. - */ -static void bfq_prepare_request(struct request *rq) -{ - rq->elv.icq = ioc_find_get_icq(rq->q); - - /* - * Regardless of whether we have an icq attached, we have to - * clear the scheduler pointers, as they might point to - * previously allocated bic/bfqq structs. - */ - rq->elv.priv[0] = rq->elv.priv[1] = NULL; -} - -static struct bfq_queue *bfq_waker_bfqq(struct bfq_queue *bfqq) -{ - struct bfq_queue *new_bfqq = bfqq->new_bfqq; - struct bfq_queue *waker_bfqq = bfqq->waker_bfqq; - - if (!waker_bfqq) - return NULL; - - while (new_bfqq) { - if (new_bfqq == waker_bfqq) { - /* - * If waker_bfqq is in the merge chain, and current - * is the only procress. - */ - if (bfqq_process_refs(waker_bfqq) == 1) - return NULL; - break; - } - - new_bfqq = new_bfqq->new_bfqq; - } - - return waker_bfqq; -} - -static struct bfq_queue *bfq_get_bfqq_handle_split(struct bfq_data *bfqd, - struct bfq_io_cq *bic, - struct bio *bio, - unsigned int idx, - bool is_sync) -{ - struct bfq_queue *waker_bfqq; - struct bfq_queue *bfqq; - bool new_queue = false; - - bfqq = __bfq_get_bfqq_handle_split(bfqd, bic, bio, false, is_sync, - &new_queue); - if (unlikely(new_queue)) - return bfqq; - - /* If the queue was seeky for too long, break it apart. */ - if (!bfq_bfqq_coop(bfqq) || !bfq_bfqq_split_coop(bfqq) || - bic->bfqq_data[idx].stably_merged) - return bfqq; - - waker_bfqq = bfq_waker_bfqq(bfqq); - - /* Update bic before losing reference to bfqq */ - if (bfq_bfqq_in_large_burst(bfqq)) - bic->bfqq_data[idx].saved_in_large_burst = true; - - bfqq = bfq_split_bfqq(bic, bfqq); - if (bfqq) { - bfq_bfqq_resume_state(bfqq, bfqd, bic, true); - return bfqq; - } - - bfqq = __bfq_get_bfqq_handle_split(bfqd, bic, bio, true, is_sync, NULL); - if (unlikely(bfqq == &bfqd->oom_bfqq)) - return bfqq; - - bfq_bfqq_resume_state(bfqq, bfqd, bic, false); - bfqq->waker_bfqq = waker_bfqq; - bfqq->tentative_waker_bfqq = NULL; - - /* - * If the waker queue disappears, then new_bfqq->waker_bfqq must be - * reset. So insert new_bfqq into the - * woken_list of the waker. See - * bfq_check_waker for details. - */ - if (waker_bfqq) - hlist_add_head(&bfqq->woken_list_node, - &bfqq->waker_bfqq->woken_list); - - return bfqq; -} - -/* - * If needed, init rq, allocate bfq data structures associated with - * rq, and increment reference counters in the destination bfq_queue - * for rq. Return the destination bfq_queue for rq, or NULL is rq is - * not associated with any bfq_queue. - * - * This function is invoked by the functions that perform rq insertion - * or merging. One may have expected the above preparation operations - * to be performed in bfq_prepare_request, and not delayed to when rq - * is inserted or merged. The rationale behind this delayed - * preparation is that, after the prepare_request hook is invoked for - * rq, rq may still be transformed into a request with no icq, i.e., a - * request not associated with any queue. No bfq hook is invoked to - * signal this transformation. As a consequence, should these - * preparation operations be performed when the prepare_request hook - * is invoked, and should rq be transformed one moment later, bfq - * would end up in an inconsistent state, because it would have - * incremented some queue counters for an rq destined to - * transformation, without any chance to correctly lower these - * counters back. In contrast, no transformation can still happen for - * rq after rq has been inserted or merged. So, it is safe to execute - * these preparation operations when rq is finally inserted or merged. - */ -static struct bfq_queue *bfq_init_rq(struct request *rq) -{ - struct request_queue *q = rq->q; - struct bio *bio = rq->bio; - struct bfq_data *bfqd = q->elevator->elevator_data; - struct bfq_io_cq *bic; - const int is_sync = rq_is_sync(rq); - struct bfq_queue *bfqq; - unsigned int a_idx = bfq_actuator_index(bfqd, bio); - - if (unlikely(!rq->elv.icq)) - return NULL; - - /* - * Assuming that RQ_BFQQ(rq) is set only if everything is set - * for this rq. This holds true, because this function is - * invoked only for insertion or merging, and, after such - * events, a request cannot be manipulated any longer before - * being removed from bfq. - */ - if (RQ_BFQQ(rq)) - return RQ_BFQQ(rq); - - bic = icq_to_bic(rq->elv.icq); - bfq_check_ioprio_change(bic, bio); - bfq_bic_update_cgroup(bic, bio); - bfqq = bfq_get_bfqq_handle_split(bfqd, bic, bio, a_idx, is_sync); - - bfqq_request_allocated(bfqq); - bfqq->ref++; - bic->requests++; - bfq_log_bfqq(bfqd, bfqq, "get_request %p: bfqq %p, %d", - rq, bfqq, bfqq->ref); - - rq->elv.priv[0] = bic; - rq->elv.priv[1] = bfqq; - - /* - * If a bfq_queue has only one process reference, it is owned - * by only this bic: we can then set bfqq->bic = bic. in - * addition, if the queue has also just been split, we have to - * resume its state. - */ - if (likely(bfqq != &bfqd->oom_bfqq) && !bfqq->new_bfqq && - bfqq_process_refs(bfqq) == 1) - bfqq->bic = bic; - - /* - * Consider bfqq as possibly belonging to a burst of newly - * created queues only if: - * 1) A burst is actually happening (bfqd->burst_size > 0) - * or - * 2) There is no other active queue. In fact, if, in - * contrast, there are active queues not belonging to the - * possible burst bfqq may belong to, then there is no gain - * in considering bfqq as belonging to a burst, and - * therefore in not weight-raising bfqq. See comments on - * bfq_handle_burst(). - * - * This filtering also helps eliminating false positives, - * occurring when bfqq does not belong to an actual large - * burst, but some background task (e.g., a service) happens - * to trigger the creation of new queues very close to when - * bfqq and its possible companion queues are created. See - * comments on bfq_handle_burst() for further details also on - * this issue. - */ - if (unlikely(bfq_bfqq_just_created(bfqq) && - (bfqd->burst_size > 0 || - bfq_tot_busy_queues(bfqd) == 0))) - bfq_handle_burst(bfqd, bfqq); - - return bfqq; -} - -static void -bfq_idle_slice_timer_body(struct bfq_data *bfqd, struct bfq_queue *bfqq) -{ - enum bfqq_expiration reason; - unsigned long flags; - - spin_lock_irqsave(&bfqd->lock, flags); - - /* - * Considering that bfqq may be in race, we should firstly check - * whether bfqq is in service before doing something on it. If - * the bfqq in race is not in service, it has already been expired - * through __bfq_bfqq_expire func and its wait_request flags has - * been cleared in __bfq_bfqd_reset_in_service func. - */ - if (bfqq != bfqd->in_service_queue) { - spin_unlock_irqrestore(&bfqd->lock, flags); - return; - } - - bfq_clear_bfqq_wait_request(bfqq); - - if (bfq_bfqq_budget_timeout(bfqq)) - /* - * Also here the queue can be safely expired - * for budget timeout without wasting - * guarantees - */ - reason = BFQQE_BUDGET_TIMEOUT; - else if (bfqq->queued[0] == 0 && bfqq->queued[1] == 0) - /* - * The queue may not be empty upon timer expiration, - * because we may not disable the timer when the - * first request of the in-service queue arrives - * during disk idling. - */ - reason = BFQQE_TOO_IDLE; - else - goto schedule_dispatch; - - bfq_bfqq_expire(bfqd, bfqq, true, reason); - -schedule_dispatch: - bfq_schedule_dispatch(bfqd); - spin_unlock_irqrestore(&bfqd->lock, flags); -} - -/* - * Handler of the expiration of the timer running if the in-service queue - * is idling inside its time slice. - */ -static enum hrtimer_restart bfq_idle_slice_timer(struct hrtimer *timer) -{ - struct bfq_data *bfqd = container_of(timer, struct bfq_data, - idle_slice_timer); - struct bfq_queue *bfqq = bfqd->in_service_queue; - - /* - * Theoretical race here: the in-service queue can be NULL or - * different from the queue that was idling if a new request - * arrives for the current queue and there is a full dispatch - * cycle that changes the in-service queue. This can hardly - * happen, but in the worst case we just expire a queue too - * early. - */ - if (bfqq) - bfq_idle_slice_timer_body(bfqd, bfqq); - - return HRTIMER_NORESTART; -} - -static void __bfq_put_async_bfqq(struct bfq_data *bfqd, - struct bfq_queue **bfqq_ptr) -{ - struct bfq_queue *bfqq = *bfqq_ptr; - - bfq_log(bfqd, "put_async_bfqq: %p", bfqq); - if (bfqq) { - bfq_bfqq_move(bfqd, bfqq, bfqd->root_group); - - bfq_log_bfqq(bfqd, bfqq, "put_async_bfqq: putting %p, %d", - bfqq, bfqq->ref); - bfq_put_queue(bfqq); - *bfqq_ptr = NULL; - } -} - -/* - * Release all the bfqg references to its async queues. If we are - * deallocating the group these queues may still contain requests, so - * we reparent them to the root cgroup (i.e., the only one that will - * exist for sure until all the requests on a device are gone). - */ -void bfq_put_async_queues(struct bfq_data *bfqd, struct bfq_group *bfqg) -{ - int i, j, k; - - for (k = 0; k < bfqd->num_actuators; k++) { - for (i = 0; i < 2; i++) - for (j = 0; j < IOPRIO_NR_LEVELS; j++) - __bfq_put_async_bfqq(bfqd, &bfqg->async_bfqq[i][j][k]); - - __bfq_put_async_bfqq(bfqd, &bfqg->async_idle_bfqq[k]); - } -} - -/* - * See the comments on bfq_limit_depth for the purpose of - * the depths set in the function. Return minimum shallow depth we'll use. - */ -static void bfq_update_depths(struct bfq_data *bfqd, struct sbitmap_queue *bt) -{ - unsigned int depth = 1U << bt->sb.shift; - - bfqd->full_depth_shift = bt->sb.shift; - /* - * In-word depths if no bfq_queue is being weight-raised: - * leaving 25% of tags only for sync reads. - * - * In next formulas, right-shift the value - * (1U<sb.shift), instead of computing directly - * (1U<<(bt->sb.shift - something)), to be robust against - * any possible value of bt->sb.shift, without having to - * limit 'something'. - */ - /* no more than 50% of tags for async I/O */ - bfqd->word_depths[0][0] = max(depth >> 1, 1U); - /* - * no more than 75% of tags for sync writes (25% extra tags - * w.r.t. async I/O, to prevent async I/O from starving sync - * writes) - */ - bfqd->word_depths[0][1] = max((depth * 3) >> 2, 1U); - - /* - * In-word depths in case some bfq_queue is being weight- - * raised: leaving ~63% of tags for sync reads. This is the - * highest percentage for which, in our tests, application - * start-up times didn't suffer from any regression due to tag - * shortage. - */ - /* no more than ~18% of tags for async I/O */ - bfqd->word_depths[1][0] = max((depth * 3) >> 4, 1U); - /* no more than ~37% of tags for sync writes (~20% extra tags) */ - bfqd->word_depths[1][1] = max((depth * 6) >> 4, 1U); -} - -static void bfq_depth_updated(struct blk_mq_hw_ctx *hctx) -{ - struct bfq_data *bfqd = hctx->queue->elevator->elevator_data; - struct blk_mq_tags *tags = hctx->sched_tags; - - bfq_update_depths(bfqd, &tags->bitmap_tags); - sbitmap_queue_min_shallow_depth(&tags->bitmap_tags, 1); -} - -static int bfq_init_hctx(struct blk_mq_hw_ctx *hctx, unsigned int index) -{ - bfq_depth_updated(hctx); - return 0; -} - -static void bfq_exit_queue(struct elevator_queue *e) -{ - struct bfq_data *bfqd = e->elevator_data; - struct bfq_queue *bfqq, *n; - unsigned int actuator; - - hrtimer_cancel(&bfqd->idle_slice_timer); - - spin_lock_irq(&bfqd->lock); - list_for_each_entry_safe(bfqq, n, &bfqd->idle_list, bfqq_list) - bfq_deactivate_bfqq(bfqd, bfqq, false, false); - spin_unlock_irq(&bfqd->lock); - - for (actuator = 0; actuator < bfqd->num_actuators; actuator++) - WARN_ON_ONCE(bfqd->rq_in_driver[actuator]); - WARN_ON_ONCE(bfqd->tot_rq_in_driver); - - hrtimer_cancel(&bfqd->idle_slice_timer); - - /* release oom-queue reference to root group */ - bfqg_and_blkg_put(bfqd->root_group); - -#ifdef CONFIG_BFQ_GROUP_IOSCHED - blkcg_deactivate_policy(bfqd->queue->disk, &blkcg_policy_bfq); -#else - spin_lock_irq(&bfqd->lock); - bfq_put_async_queues(bfqd, bfqd->root_group); - kfree(bfqd->root_group); - spin_unlock_irq(&bfqd->lock); -#endif - - blk_stat_disable_accounting(bfqd->queue); - clear_bit(ELEVATOR_FLAG_DISABLE_WBT, &e->flags); - wbt_enable_default(bfqd->queue->disk); - - kfree(bfqd); -} - -static void bfq_init_root_group(struct bfq_group *root_group, - struct bfq_data *bfqd) -{ - int i; - -#ifdef CONFIG_BFQ_GROUP_IOSCHED - root_group->entity.parent = NULL; - root_group->my_entity = NULL; - root_group->bfqd = bfqd; -#endif - root_group->rq_pos_tree = RB_ROOT; - for (i = 0; i < BFQ_IOPRIO_CLASSES; i++) - root_group->sched_data.service_tree[i] = BFQ_SERVICE_TREE_INIT; - root_group->sched_data.bfq_class_idle_last_service = jiffies; -} - -static int bfq_init_queue(struct request_queue *q, struct elevator_type *e) -{ - struct bfq_data *bfqd; - struct elevator_queue *eq; - unsigned int i; - struct blk_independent_access_ranges *ia_ranges = q->disk->ia_ranges; - - eq = elevator_alloc(q, e); - if (!eq) - return -ENOMEM; - - bfqd = kzalloc_node(sizeof(*bfqd), GFP_KERNEL, q->node); - if (!bfqd) { - kobject_put(&eq->kobj); - return -ENOMEM; - } - eq->elevator_data = bfqd; - - spin_lock_irq(&q->queue_lock); - q->elevator = eq; - spin_unlock_irq(&q->queue_lock); - - /* - * Our fallback bfqq if bfq_find_alloc_queue() runs into OOM issues. - * Grab a permanent reference to it, so that the normal code flow - * will not attempt to free it. - * Set zero as actuator index: we will pretend that - * all I/O requests are for the same actuator. - */ - bfq_init_bfqq(bfqd, &bfqd->oom_bfqq, NULL, 1, 0, 0); - bfqd->oom_bfqq.ref++; - bfqd->oom_bfqq.new_ioprio = BFQ_DEFAULT_QUEUE_IOPRIO; - bfqd->oom_bfqq.new_ioprio_class = IOPRIO_CLASS_BE; - bfqd->oom_bfqq.entity.new_weight = - bfq_ioprio_to_weight(bfqd->oom_bfqq.new_ioprio); - - /* oom_bfqq does not participate to bursts */ - bfq_clear_bfqq_just_created(&bfqd->oom_bfqq); - - /* - * Trigger weight initialization, according to ioprio, at the - * oom_bfqq's first activation. The oom_bfqq's ioprio and ioprio - * class won't be changed any more. - */ - bfqd->oom_bfqq.entity.prio_changed = 1; - - bfqd->queue = q; - - bfqd->num_actuators = 1; - /* - * If the disk supports multiple actuators, copy independent - * access ranges from the request queue structure. - */ - spin_lock_irq(&q->queue_lock); - if (ia_ranges) { - /* - * Check if the disk ia_ranges size exceeds the current bfq - * actuator limit. - */ - if (ia_ranges->nr_ia_ranges > BFQ_MAX_ACTUATORS) { - pr_crit("nr_ia_ranges higher than act limit: iars=%d, max=%d.\n", - ia_ranges->nr_ia_ranges, BFQ_MAX_ACTUATORS); - pr_crit("Falling back to single actuator mode.\n"); - } else { - bfqd->num_actuators = ia_ranges->nr_ia_ranges; - - for (i = 0; i < bfqd->num_actuators; i++) { - bfqd->sector[i] = ia_ranges->ia_range[i].sector; - bfqd->nr_sectors[i] = - ia_ranges->ia_range[i].nr_sectors; - } - } - } - - /* Otherwise use single-actuator dev info */ - if (bfqd->num_actuators == 1) { - bfqd->sector[0] = 0; - bfqd->nr_sectors[0] = get_capacity(q->disk); - } - spin_unlock_irq(&q->queue_lock); - - INIT_LIST_HEAD(&bfqd->dispatch); - - hrtimer_init(&bfqd->idle_slice_timer, CLOCK_MONOTONIC, - HRTIMER_MODE_REL); - bfqd->idle_slice_timer.function = bfq_idle_slice_timer; - - bfqd->queue_weights_tree = RB_ROOT_CACHED; -#ifdef CONFIG_BFQ_GROUP_IOSCHED - bfqd->num_groups_with_pending_reqs = 0; -#endif - - INIT_LIST_HEAD(&bfqd->active_list[0]); - INIT_LIST_HEAD(&bfqd->active_list[1]); - INIT_LIST_HEAD(&bfqd->idle_list); - INIT_HLIST_HEAD(&bfqd->burst_list); - - bfqd->hw_tag = -1; - bfqd->nonrot_with_queueing = blk_queue_nonrot(bfqd->queue); - - bfqd->bfq_max_budget = bfq_default_max_budget; - - bfqd->bfq_fifo_expire[0] = bfq_fifo_expire[0]; - bfqd->bfq_fifo_expire[1] = bfq_fifo_expire[1]; - bfqd->bfq_back_max = bfq_back_max; - bfqd->bfq_back_penalty = bfq_back_penalty; - bfqd->bfq_slice_idle = bfq_slice_idle; - bfqd->bfq_timeout = bfq_timeout; - - bfqd->bfq_large_burst_thresh = 8; - bfqd->bfq_burst_interval = msecs_to_jiffies(180); - - bfqd->low_latency = true; - - /* - * Trade-off between responsiveness and fairness. - */ - bfqd->bfq_wr_coeff = 30; - bfqd->bfq_wr_rt_max_time = msecs_to_jiffies(300); - bfqd->bfq_wr_min_idle_time = msecs_to_jiffies(2000); - bfqd->bfq_wr_min_inter_arr_async = msecs_to_jiffies(500); - bfqd->bfq_wr_max_softrt_rate = 7000; /* - * Approximate rate required - * to playback or record a - * high-definition compressed - * video. - */ - bfqd->wr_busy_queues = 0; - - /* - * Begin by assuming, optimistically, that the device peak - * rate is equal to 2/3 of the highest reference rate. - */ - bfqd->rate_dur_prod = ref_rate[blk_queue_nonrot(bfqd->queue)] * - ref_wr_duration[blk_queue_nonrot(bfqd->queue)]; - bfqd->peak_rate = ref_rate[blk_queue_nonrot(bfqd->queue)] * 2 / 3; - - /* see comments on the definition of next field inside bfq_data */ - bfqd->actuator_load_threshold = 4; - - spin_lock_init(&bfqd->lock); - - /* - * The invocation of the next bfq_create_group_hierarchy - * function is the head of a chain of function calls - * (bfq_create_group_hierarchy->blkcg_activate_policy-> - * blk_mq_freeze_queue) that may lead to the invocation of the - * has_work hook function. For this reason, - * bfq_create_group_hierarchy is invoked only after all - * scheduler data has been initialized, apart from the fields - * that can be initialized only after invoking - * bfq_create_group_hierarchy. This, in particular, enables - * has_work to correctly return false. Of course, to avoid - * other inconsistencies, the blk-mq stack must then refrain - * from invoking further scheduler hooks before this init - * function is finished. - */ - bfqd->root_group = bfq_create_group_hierarchy(bfqd, q->node); - if (!bfqd->root_group) - goto out_free; - bfq_init_root_group(bfqd->root_group, bfqd); - bfq_init_entity(&bfqd->oom_bfqq.entity, bfqd->root_group); - - /* We dispatch from request queue wide instead of hw queue */ - blk_queue_flag_set(QUEUE_FLAG_SQ_SCHED, q); - - set_bit(ELEVATOR_FLAG_DISABLE_WBT, &eq->flags); - wbt_disable_default(q->disk); - blk_stat_enable_accounting(q); - - return 0; - -out_free: - kfree(bfqd); - kobject_put(&eq->kobj); - return -ENOMEM; -} - -static void bfq_slab_kill(void) -{ - kmem_cache_destroy(bfq_pool); -} - -static int __init bfq_slab_setup(void) -{ - bfq_pool = KMEM_CACHE(bfq_queue, 0); - if (!bfq_pool) - return -ENOMEM; - return 0; -} - -static ssize_t bfq_var_show(unsigned int var, char *page) -{ - return sprintf(page, "%u\n", var); -} - -static int bfq_var_store(unsigned long *var, const char *page) -{ - unsigned long new_val; - int ret = kstrtoul(page, 10, &new_val); - - if (ret) - return ret; - *var = new_val; - return 0; -} - -#define SHOW_FUNCTION(__FUNC, __VAR, __CONV) \ -static ssize_t __FUNC(struct elevator_queue *e, char *page) \ -{ \ - struct bfq_data *bfqd = e->elevator_data; \ - u64 __data = __VAR; \ - if (__CONV == 1) \ - __data = jiffies_to_msecs(__data); \ - else if (__CONV == 2) \ - __data = div_u64(__data, NSEC_PER_MSEC); \ - return bfq_var_show(__data, (page)); \ -} -SHOW_FUNCTION(bfq_fifo_expire_sync_show, bfqd->bfq_fifo_expire[1], 2); -SHOW_FUNCTION(bfq_fifo_expire_async_show, bfqd->bfq_fifo_expire[0], 2); -SHOW_FUNCTION(bfq_back_seek_max_show, bfqd->bfq_back_max, 0); -SHOW_FUNCTION(bfq_back_seek_penalty_show, bfqd->bfq_back_penalty, 0); -SHOW_FUNCTION(bfq_slice_idle_show, bfqd->bfq_slice_idle, 2); -SHOW_FUNCTION(bfq_max_budget_show, bfqd->bfq_user_max_budget, 0); -SHOW_FUNCTION(bfq_timeout_sync_show, bfqd->bfq_timeout, 1); -SHOW_FUNCTION(bfq_strict_guarantees_show, bfqd->strict_guarantees, 0); -SHOW_FUNCTION(bfq_low_latency_show, bfqd->low_latency, 0); -#undef SHOW_FUNCTION - -#define USEC_SHOW_FUNCTION(__FUNC, __VAR) \ -static ssize_t __FUNC(struct elevator_queue *e, char *page) \ -{ \ - struct bfq_data *bfqd = e->elevator_data; \ - u64 __data = __VAR; \ - __data = div_u64(__data, NSEC_PER_USEC); \ - return bfq_var_show(__data, (page)); \ -} -USEC_SHOW_FUNCTION(bfq_slice_idle_us_show, bfqd->bfq_slice_idle); -#undef USEC_SHOW_FUNCTION - -#define STORE_FUNCTION(__FUNC, __PTR, MIN, MAX, __CONV) \ -static ssize_t \ -__FUNC(struct elevator_queue *e, const char *page, size_t count) \ -{ \ - struct bfq_data *bfqd = e->elevator_data; \ - unsigned long __data, __min = (MIN), __max = (MAX); \ - int ret; \ - \ - ret = bfq_var_store(&__data, (page)); \ - if (ret) \ - return ret; \ - if (__data < __min) \ - __data = __min; \ - else if (__data > __max) \ - __data = __max; \ - if (__CONV == 1) \ - *(__PTR) = msecs_to_jiffies(__data); \ - else if (__CONV == 2) \ - *(__PTR) = (u64)__data * NSEC_PER_MSEC; \ - else \ - *(__PTR) = __data; \ - return count; \ -} -STORE_FUNCTION(bfq_fifo_expire_sync_store, &bfqd->bfq_fifo_expire[1], 1, - INT_MAX, 2); -STORE_FUNCTION(bfq_fifo_expire_async_store, &bfqd->bfq_fifo_expire[0], 1, - INT_MAX, 2); -STORE_FUNCTION(bfq_back_seek_max_store, &bfqd->bfq_back_max, 0, INT_MAX, 0); -STORE_FUNCTION(bfq_back_seek_penalty_store, &bfqd->bfq_back_penalty, 1, - INT_MAX, 0); -STORE_FUNCTION(bfq_slice_idle_store, &bfqd->bfq_slice_idle, 0, INT_MAX, 2); -#undef STORE_FUNCTION - -#define USEC_STORE_FUNCTION(__FUNC, __PTR, MIN, MAX) \ -static ssize_t __FUNC(struct elevator_queue *e, const char *page, size_t count)\ -{ \ - struct bfq_data *bfqd = e->elevator_data; \ - unsigned long __data, __min = (MIN), __max = (MAX); \ - int ret; \ - \ - ret = bfq_var_store(&__data, (page)); \ - if (ret) \ - return ret; \ - if (__data < __min) \ - __data = __min; \ - else if (__data > __max) \ - __data = __max; \ - *(__PTR) = (u64)__data * NSEC_PER_USEC; \ - return count; \ -} -USEC_STORE_FUNCTION(bfq_slice_idle_us_store, &bfqd->bfq_slice_idle, 0, - UINT_MAX); -#undef USEC_STORE_FUNCTION - -static ssize_t bfq_max_budget_store(struct elevator_queue *e, - const char *page, size_t count) -{ - struct bfq_data *bfqd = e->elevator_data; - unsigned long __data; - int ret; - - ret = bfq_var_store(&__data, (page)); - if (ret) - return ret; - - if (__data == 0) - bfqd->bfq_max_budget = bfq_calc_max_budget(bfqd); - else { - if (__data > INT_MAX) - __data = INT_MAX; - bfqd->bfq_max_budget = __data; - } - - bfqd->bfq_user_max_budget = __data; - - return count; -} - -/* - * Leaving this name to preserve name compatibility with cfq - * parameters, but this timeout is used for both sync and async. - */ -static ssize_t bfq_timeout_sync_store(struct elevator_queue *e, - const char *page, size_t count) -{ - struct bfq_data *bfqd = e->elevator_data; - unsigned long __data; - int ret; - - ret = bfq_var_store(&__data, (page)); - if (ret) - return ret; - - if (__data < 1) - __data = 1; - else if (__data > INT_MAX) - __data = INT_MAX; - - bfqd->bfq_timeout = msecs_to_jiffies(__data); - if (bfqd->bfq_user_max_budget == 0) - bfqd->bfq_max_budget = bfq_calc_max_budget(bfqd); - - return count; -} - -static ssize_t bfq_strict_guarantees_store(struct elevator_queue *e, - const char *page, size_t count) -{ - struct bfq_data *bfqd = e->elevator_data; - unsigned long __data; - int ret; - - ret = bfq_var_store(&__data, (page)); - if (ret) - return ret; - - if (__data > 1) - __data = 1; - if (!bfqd->strict_guarantees && __data == 1 - && bfqd->bfq_slice_idle < 8 * NSEC_PER_MSEC) - bfqd->bfq_slice_idle = 8 * NSEC_PER_MSEC; - - bfqd->strict_guarantees = __data; - - return count; -} - -static ssize_t bfq_low_latency_store(struct elevator_queue *e, - const char *page, size_t count) -{ - struct bfq_data *bfqd = e->elevator_data; - unsigned long __data; - int ret; - - ret = bfq_var_store(&__data, (page)); - if (ret) - return ret; - - if (__data > 1) - __data = 1; - if (__data == 0 && bfqd->low_latency != 0) - bfq_end_wr(bfqd); - bfqd->low_latency = __data; - - return count; -} - -#define BFQ_ATTR(name) \ - __ATTR(name, 0644, bfq_##name##_show, bfq_##name##_store) - -static struct elv_fs_entry bfq_attrs[] = { - BFQ_ATTR(fifo_expire_sync), - BFQ_ATTR(fifo_expire_async), - BFQ_ATTR(back_seek_max), - BFQ_ATTR(back_seek_penalty), - BFQ_ATTR(slice_idle), - BFQ_ATTR(slice_idle_us), - BFQ_ATTR(max_budget), - BFQ_ATTR(timeout_sync), - BFQ_ATTR(strict_guarantees), - BFQ_ATTR(low_latency), - __ATTR_NULL -}; - -static struct elevator_type iosched_bfq_mq = { - .ops = { - .limit_depth = bfq_limit_depth, - .prepare_request = bfq_prepare_request, - .requeue_request = bfq_finish_requeue_request, - .finish_request = bfq_finish_request, - .exit_icq = bfq_exit_icq, - .insert_requests = bfq_insert_requests, - .dispatch_request = bfq_dispatch_request, - .next_request = elv_rb_latter_request, - .former_request = elv_rb_former_request, - .allow_merge = bfq_allow_bio_merge, - .bio_merge = bfq_bio_merge, - .request_merge = bfq_request_merge, - .requests_merged = bfq_requests_merged, - .request_merged = bfq_request_merged, - .has_work = bfq_has_work, - .depth_updated = bfq_depth_updated, - .init_hctx = bfq_init_hctx, - .init_sched = bfq_init_queue, - .exit_sched = bfq_exit_queue, - }, - - .icq_size = sizeof(struct bfq_io_cq), - .icq_align = __alignof__(struct bfq_io_cq), - .elevator_attrs = bfq_attrs, - .elevator_name = "bfq", - .elevator_owner = THIS_MODULE, -}; -MODULE_ALIAS("bfq-iosched"); - -static int __init bfq_init(void) -{ - int ret; - -#ifdef CONFIG_BFQ_GROUP_IOSCHED - ret = blkcg_policy_register(&blkcg_policy_bfq); - if (ret) - return ret; -#endif - - ret = -ENOMEM; - if (bfq_slab_setup()) - goto err_pol_unreg; - - /* - * Times to load large popular applications for the typical - * systems installed on the reference devices (see the - * comments before the definition of the next - * array). Actually, we use slightly lower values, as the - * estimated peak rate tends to be smaller than the actual - * peak rate. The reason for this last fact is that estimates - * are computed over much shorter time intervals than the long - * intervals typically used for benchmarking. Why? First, to - * adapt more quickly to variations. Second, because an I/O - * scheduler cannot rely on a peak-rate-evaluation workload to - * be run for a long time. - */ - ref_wr_duration[0] = msecs_to_jiffies(7000); /* actually 8 sec */ - ref_wr_duration[1] = msecs_to_jiffies(2500); /* actually 3 sec */ - - ret = elv_register(&iosched_bfq_mq); - if (ret) - goto slab_kill; - - return 0; - -slab_kill: - bfq_slab_kill(); -err_pol_unreg: -#ifdef CONFIG_BFQ_GROUP_IOSCHED - blkcg_policy_unregister(&blkcg_policy_bfq); -#endif - return ret; -} - -static void __exit bfq_exit(void) -{ - elv_unregister(&iosched_bfq_mq); -#ifdef CONFIG_BFQ_GROUP_IOSCHED - blkcg_policy_unregister(&blkcg_policy_bfq); -#endif - bfq_slab_kill(); -} - -module_init(bfq_init); -module_exit(bfq_exit); - -MODULE_AUTHOR("Paolo Valente"); -MODULE_LICENSE("GPL"); -MODULE_DESCRIPTION("MQ Budget Fair Queueing I/O Scheduler");