linux/fs/xfs/xfs_log_cil.c

// SPDX-License-Identifier: GPL-2.0
/*
 * Copyright (c) 2010 Red Hat, Inc. All Rights Reserved.
 */

#include "xfs.h"
#include "xfs_fs.h"
#include "xfs_format.h"
#include "xfs_log_format.h"
#include "xfs_shared.h"
#include "xfs_trans_resv.h"
#include "xfs_mount.h"
#include "xfs_extent_busy.h"
#include "xfs_trans.h"
#include "xfs_trans_priv.h"
#include "xfs_log.h"
#include "xfs_log_priv.h"
#include "xfs_trace.h"

struct workqueue_struct *xfs_discard_wq;

/*
 * Allocate a new ticket. Failing to get a new ticket makes it really hard to
 * recover, so we don't allow failure here. Also, we allocate in a context that
 * we don't want to be issuing transactions from, so we need to tell the
 * allocation code this as well.
 *
 * We don't reserve any space for the ticket - we are going to steal whatever
 * space we require from transactions as they commit. To ensure we reserve all
 * the space required, we need to set the current reservation of the ticket to
 * zero so that we know to steal the initial transaction overhead from the
 * first transaction commit.
 */
static struct xlog_ticket *
xlog_cil_ticket_alloc(
	struct xlog	*log)
{
	struct xlog_ticket *tic;

	tic = xlog_ticket_alloc(log, 0, 1, XFS_TRANSACTION, 0);

	/*
	 * set the current reservation to zero so we know to steal the basic
	 * transaction overhead reservation from the first transaction commit.
	 */
	tic->t_curr_res = 0;
	return tic;
}

/*
 * Unavoidable forward declaration - xlog_cil_push_work() calls
 * xlog_cil_ctx_alloc() itself.
 */
static void xlog_cil_push_work(struct work_struct *work);

static struct xfs_cil_ctx *
xlog_cil_ctx_alloc(void)
{
	struct xfs_cil_ctx	*ctx;

	ctx = kmem_zalloc(sizeof(*ctx), KM_NOFS);
	INIT_LIST_HEAD(&ctx->committing);
	INIT_LIST_HEAD(&ctx->busy_extents);
	INIT_WORK(&ctx->push_work, xlog_cil_push_work);
	return ctx;
}

static void
xlog_cil_ctx_switch(
	struct xfs_cil		*cil,
	struct xfs_cil_ctx	*ctx)
{
	ctx->sequence = ++cil->xc_current_sequence;
	ctx->cil = cil;
	cil->xc_ctx = ctx;
}

/*
 * After the first stage of log recovery is done, we know where the head and
 * tail of the log are. We need this log initialisation done before we can
 * initialise the first CIL checkpoint context.
 *
 * Here we allocate a log ticket to track space usage during a CIL push.  This
 * ticket is passed to xlog_write() directly so that we don't slowly leak log
 * space by failing to account for space used by log headers and additional
 * region headers for split regions.
 */
void
xlog_cil_init_post_recovery(
	struct xlog	*log)
{
	log->l_cilp->xc_ctx->ticket = xlog_cil_ticket_alloc(log);
	log->l_cilp->xc_ctx->sequence = 1;
}

static inline int
xlog_cil_iovec_space(
	uint	niovecs)
{
	return round_up((sizeof(struct xfs_log_vec) +
					niovecs * sizeof(struct xfs_log_iovec)),
			sizeof(uint64_t));
}

/*
 * shadow buffers can be large, so we need to use kvmalloc() here to ensure
 * success. Unfortunately, kvmalloc() only allows GFP_KERNEL contexts to fall
 * back to vmalloc, so we can't actually do anything useful with gfp flags to
 * control the kmalloc() behaviour within kvmalloc(). Hence kmalloc() will do
 * direct reclaim and compaction in the slow path, both of which are
 * horrendously expensive. We just want kmalloc to fail fast and fall back to
 * vmalloc if it can't get somethign straight away from the free lists or buddy
 * allocator. Hence we have to open code kvmalloc outselves here.
 *
 * Also, we are in memalloc_nofs_save task context here, so despite the use of
 * GFP_KERNEL here, we are actually going to be doing GFP_NOFS allocations. This
 * is actually the only way to make vmalloc() do GFP_NOFS allocations, so lets
 * just all pretend this is a GFP_KERNEL context operation....
 */
static inline void *
xlog_cil_kvmalloc(
	size_t		buf_size)
{
	gfp_t		flags = GFP_KERNEL;
	void		*p;

	flags &= ~__GFP_DIRECT_RECLAIM;
	flags |= __GFP_NOWARN | __GFP_NORETRY;
	do {
		p = kmalloc(buf_size, flags);
		if (!p)
			p = vmalloc(buf_size);
	} while (!p);

	return p;
}

/*
 * Allocate or pin log vector buffers for CIL insertion.
 *
 * The CIL currently uses disposable buffers for copying a snapshot of the
 * modified items into the log during a push. The biggest problem with this is
 * the requirement to allocate the disposable buffer during the commit if:
 *	a) does not exist; or
 *	b) it is too small
 *
 * If we do this allocation within xlog_cil_insert_format_items(), it is done
 * under the xc_ctx_lock, which means that a CIL push cannot occur during
 * the memory allocation. This means that we have a potential deadlock situation
 * under low memory conditions when we have lots of dirty metadata pinned in
 * the CIL and we need a CIL commit to occur to free memory.
 *
 * To avoid this, we need to move the memory allocation outside the
 * xc_ctx_lock, but because the log vector buffers are disposable, that opens
 * up a TOCTOU race condition w.r.t. the CIL committing and removing the log
 * vector buffers between the check and the formatting of the item into the
 * log vector buffer within the xc_ctx_lock.
 *
 * Because the log vector buffer needs to be unchanged during the CIL push
 * process, we cannot share the buffer between the transaction commit (which
 * modifies the buffer) and the CIL push context that is writing the changes
 * into the log. This means skipping preallocation of buffer space is
 * unreliable, but we most definitely do not want to be allocating and freeing
 * buffers unnecessarily during commits when overwrites can be done safely.
 *
 * The simplest solution to this problem is to allocate a shadow buffer when a
 * log item is committed for the second time, and then to only use this buffer
 * if necessary. The buffer can remain attached to the log item until such time
 * it is needed, and this is the buffer that is reallocated to match the size of
 * the incoming modification. Then during the formatting of the item we can swap
 * the active buffer with the new one if we can't reuse the existing buffer. We
 * don't free the old buffer as it may be reused on the next modification if
 * it's size is right, otherwise we'll free and reallocate it at that point.
 *
 * This function builds a vector for the changes in each log item in the
 * transaction. It then works out the length of the buffer needed for each log
 * item, allocates them and attaches the vector to the log item in preparation
 * for the formatting step which occurs under the xc_ctx_lock.
 *
 * While this means the memory footprint goes up, it avoids the repeated
 * alloc/free pattern that repeated modifications of an item would otherwise
 * cause, and hence minimises the CPU overhead of such behaviour.
 */
static void
xlog_cil_alloc_shadow_bufs(
	struct xlog		*log,
	struct xfs_trans	*tp)
{
	struct xfs_log_item	*lip;

	list_for_each_entry(lip, &tp->t_items, li_trans) {
		struct xfs_log_vec *lv;
		int	niovecs = 0;
		int	nbytes = 0;
		int	buf_size;
		bool	ordered = false;

		/* Skip items which aren't dirty in this transaction. */
		if (!test_bit(XFS_LI_DIRTY, &lip->li_flags))
			continue;

		/* get number of vecs and size of data to be stored */
		lip->li_ops->iop_size(lip, &niovecs, &nbytes);

		/*
		 * Ordered items need to be tracked but we do not wish to write
		 * them. We need a logvec to track the object, but we do not
		 * need an iovec or buffer to be allocated for copying data.
		 */
		if (niovecs == XFS_LOG_VEC_ORDERED) {
			ordered = true;
			niovecs = 0;
			nbytes = 0;
		}

		/*
		 * We 64-bit align the length of each iovec so that the start
		 * of the next one is naturally aligned.  We'll need to
		 * account for that slack space here. Then round nbytes up
		 * to 64-bit alignment so that the initial buffer alignment is
		 * easy to calculate and verify.
		 */
		nbytes += niovecs * sizeof(uint64_t);
		nbytes = round_up(nbytes, sizeof(uint64_t));

		/*
		 * The data buffer needs to start 64-bit aligned, so round up
		 * that space to ensure we can align it appropriately and not
		 * overrun the buffer.
		 */
		buf_size = nbytes + xlog_cil_iovec_space(niovecs);

		/*
		 * if we have no shadow buffer, or it is too small, we need to
		 * reallocate it.
		 */
		if (!lip->li_lv_shadow ||
		    buf_size > lip->li_lv_shadow->lv_size) {
			/*
			 * We free and allocate here as a realloc would copy
			 * unnecessary data. We don't use kvzalloc() for the
			 * same reason - we don't need to zero the data area in
			 * the buffer, only the log vector header and the iovec
			 * storage.
			 */
			kmem_free(lip->li_lv_shadow);
			lv = xlog_cil_kvmalloc(buf_size);

			memset(lv, 0, xlog_cil_iovec_space(niovecs));

			lv->lv_item = lip;
			lv->lv_size = buf_size;
			if (ordered)
				lv->lv_buf_len = XFS_LOG_VEC_ORDERED;
			else
				lv->lv_iovecp = (struct xfs_log_iovec *)&lv[1];
			lip->li_lv_shadow = lv;
		} else {
			/* same or smaller, optimise common overwrite case */
			lv = lip->li_lv_shadow;
			if (ordered)
				lv->lv_buf_len = XFS_LOG_VEC_ORDERED;
			else
				lv->lv_buf_len = 0;
			lv->lv_bytes = 0;
			lv->lv_next = NULL;
		}

		/* Ensure the lv is set up according to ->iop_size */
		lv->lv_niovecs = niovecs;

		/* The allocated data region lies beyond the iovec region */
		lv->lv_buf = (char *)lv + xlog_cil_iovec_space(niovecs);
	}

}

/*
 * Prepare the log item for insertion into the CIL. Calculate the difference in
 * log space and vectors it will consume, and if it is a new item pin it as
 * well.
 */
STATIC void
xfs_cil_prepare_item(
	struct xlog		*log,
	struct xfs_log_vec	*lv,
	struct xfs_log_vec	*old_lv,
	int			*diff_len,
	int			*diff_iovecs)
{
	/* Account for the new LV being passed in */
	if (lv->lv_buf_len != XFS_LOG_VEC_ORDERED) {
		*diff_len += lv->lv_bytes;
		*diff_iovecs += lv->lv_niovecs;
	}

	/*
	 * If there is no old LV, this is the first time we've seen the item in
	 * this CIL context and so we need to pin it. If we are replacing the
	 * old_lv, then remove the space it accounts for and make it the shadow
	 * buffer for later freeing. In both cases we are now switching to the
	 * shadow buffer, so update the pointer to it appropriately.
	 */
	if (!old_lv) {
		if (lv->lv_item->li_ops->iop_pin)
			lv->lv_item->li_ops->iop_pin(lv->lv_item);
		lv->lv_item->li_lv_shadow = NULL;
	} else if (old_lv != lv) {
		ASSERT(lv->lv_buf_len != XFS_LOG_VEC_ORDERED);

		*diff_len -= old_lv->lv_bytes;
		*diff_iovecs -= old_lv->lv_niovecs;
		lv->lv_item->li_lv_shadow = old_lv;
	}

	/* attach new log vector to log item */
	lv->lv_item->li_lv = lv;

	/*
	 * If this is the first time the item is being committed to the
	 * CIL, store the sequence number on the log item so we can
	 * tell in future commits whether this is the first checkpoint
	 * the item is being committed into.
	 */
	if (!lv->lv_item->li_seq)
		lv->lv_item->li_seq = log->l_cilp->xc_ctx->sequence;
}

/*
 * Format log item into a flat buffers
 *
 * For delayed logging, we need to hold a formatted buffer containing all the
 * changes on the log item. This enables us to relog the item in memory and
 * write it out asynchronously without needing to relock the object that was
 * modified at the time it gets written into the iclog.
 *
 * This function takes the prepared log vectors attached to each log item, and
 * formats the changes into the log vector buffer. The buffer it uses is
 * dependent on the current state of the vector in the CIL - the shadow lv is
 * guaranteed to be large enough for the current modification, but we will only
 * use that if we can't reuse the existing lv. If we can't reuse the existing
 * lv, then simple swap it out for the shadow lv. We don't free it - that is
 * done lazily either by th enext modification or the freeing of the log item.
 *
 * We don't set up region headers during this process; we simply copy the
 * regions into the flat buffer. We can do this because we still have to do a
 * formatting step to write the regions into the iclog buffer.  Writing the
 * ophdrs during the iclog write means that we can support splitting large
 * regions across iclog boundares without needing a change in the format of the
 * item/region encapsulation.
 *
 * Hence what we need to do now is change the rewrite the vector array to point
 * to the copied region inside the buffer we just allocated. This allows us to
 * format the regions into the iclog as though they are being formatted
 * directly out of the objects themselves.
 */
static void
xlog_cil_insert_format_items(
	struct xlog		*log,
	struct xfs_trans	*tp,
	int			*diff_len,
	int			*diff_iovecs)
{
	struct xfs_log_item	*lip;


	/* Bail out if we didn't find a log item.  */
	if (list_empty(&tp->t_items)) {
		ASSERT(0);
		return;
	}

	list_for_each_entry(lip, &tp->t_items, li_trans) {
		struct xfs_log_vec *lv;
		struct xfs_log_vec *old_lv = NULL;
		struct xfs_log_vec *shadow;
		bool	ordered = false;

		/* Skip items which aren't dirty in this transaction. */
		if (!test_bit(XFS_LI_DIRTY, &lip->li_flags))
			continue;

		/*
		 * The formatting size information is already attached to
		 * the shadow lv on the log item.
		 */
		shadow = lip->li_lv_shadow;
		if (shadow->lv_buf_len == XFS_LOG_VEC_ORDERED)
			ordered = true;

		/* Skip items that do not have any vectors for writing */
		if (!shadow->lv_niovecs && !ordered)
			continue;

		/* compare to existing item size */
		old_lv = lip->li_lv;
		if (lip->li_lv && shadow->lv_size <= lip->li_lv->lv_size) {
			/* same or smaller, optimise common overwrite case */
			lv = lip->li_lv;
			lv->lv_next = NULL;

			if (ordered)
				goto insert;

			/*
			 * set the item up as though it is a new insertion so
			 * that the space reservation accounting is correct.
			 */
			*diff_iovecs -= lv->lv_niovecs;
			*diff_len -= lv->lv_bytes;

			/* Ensure the lv is set up according to ->iop_size */
			lv->lv_niovecs = shadow->lv_niovecs;

			/* reset the lv buffer information for new formatting */
			lv->lv_buf_len = 0;
			lv->lv_bytes = 0;
			lv->lv_buf = (char *)lv +
					xlog_cil_iovec_space(lv->lv_niovecs);
		} else {
			/* switch to shadow buffer! */
			lv = shadow;
			lv->lv_item = lip;
			if (ordered) {
				/* track as an ordered logvec */
				ASSERT(lip->li_lv == NULL);
				goto insert;
			}
		}

		ASSERT(IS_ALIGNED((unsigned long)lv->lv_buf, sizeof(uint64_t)));
		lip->li_ops->iop_format(lip, lv);
insert:
		xfs_cil_prepare_item(log, lv, old_lv, diff_len, diff_iovecs);
	}
}

/*
 * Insert the log items into the CIL and calculate the difference in space
 * consumed by the item. Add the space to the checkpoint ticket and calculate
 * if the change requires additional log metadata. If it does, take that space
 * as well. Remove the amount of space we added to the checkpoint ticket from
 * the current transaction ticket so that the accounting works out correctly.
 */
static void
xlog_cil_insert_items(
	struct xlog		*log,
	struct xfs_trans	*tp)
{
	struct xfs_cil		*cil = log->l_cilp;
	struct xfs_cil_ctx	*ctx = cil->xc_ctx;
	struct xfs_log_item	*lip;
	int			len = 0;
	int			diff_iovecs = 0;
	int			iclog_space;
	int			iovhdr_res = 0, split_res = 0, ctx_res = 0;

	ASSERT(tp);

	/*
	 * We can do this safely because the context can't checkpoint until we
	 * are done so it doesn't matter exactly how we update the CIL.
	 */
	xlog_cil_insert_format_items(log, tp, &len, &diff_iovecs);

	spin_lock(&cil->xc_cil_lock);

	/* account for space used by new iovec headers  */
	iovhdr_res = diff_iovecs * sizeof(xlog_op_header_t);
	len += iovhdr_res;
	ctx->nvecs += diff_iovecs;

	/* attach the transaction to the CIL if it has any busy extents */
	if (!list_empty(&tp->t_busy))
		list_splice_init(&tp->t_busy, &ctx->busy_extents);

	/*
	 * Now transfer enough transaction reservation to the context ticket
	 * for the checkpoint. The context ticket is special - the unit
	 * reservation has to grow as well as the current reservation as we
	 * steal from tickets so we can correctly determine the space used
	 * during the transaction commit.
	 */
	if (ctx->ticket->t_curr_res == 0) {
		ctx_res = ctx->ticket->t_unit_res;
		ctx->ticket->t_curr_res = ctx_res;
		tp->t_ticket->t_curr_res -= ctx_res;
	}

	/* do we need space for more log record headers? */
	iclog_space = log->l_iclog_size - log->l_iclog_hsize;
	if (len > 0 && (ctx->space_used / iclog_space !=
				(ctx->space_used + len) / iclog_space)) {
		split_res = (len + iclog_space - 1) / iclog_space;
		/* need to take into account split region headers, too */
		split_res *= log->l_iclog_hsize + sizeof(struct xlog_op_header);
		ctx->ticket->t_unit_res += split_res;
		ctx->ticket->t_curr_res += split_res;
		tp->t_ticket->t_curr_res -= split_res;
		ASSERT(tp->t_ticket->t_curr_res >= len);
	}
	tp->t_ticket->t_curr_res -= len;
	ctx->space_used += len;

	/*
	 * If we've overrun the reservation, dump the tx details before we move
	 * the log items. Shutdown is imminent...
	 */
	if (WARN_ON(tp->t_ticket->t_curr_res < 0)) {
		xfs_warn(log->l_mp, "Transaction log reservation overrun:");
		xfs_warn(log->l_mp,
			 "  log items: %d bytes (iov hdrs: %d bytes)",
			 len, iovhdr_res);
		xfs_warn(log->l_mp, "  split region headers: %d bytes",
			 split_res);
		xfs_warn(log->l_mp, "  ctx ticket: %d bytes", ctx_res);
		xlog_print_trans(tp);
	}

	/*
	 * Now (re-)position everything modified at the tail of the CIL.
	 * We do this here so we only need to take the CIL lock once during
	 * the transaction commit.
	 */
	list_for_each_entry(lip, &tp->t_items, li_trans) {

		/* Skip items which aren't dirty in this transaction. */
		if (!test_bit(XFS_LI_DIRTY, &lip->li_flags))
			continue;

		/*
		 * Only move the item if it isn't already at the tail. This is
		 * to prevent a transient list_empty() state when reinserting
		 * an item that is already the only item in the CIL.
		 */
		if (!list_is_last(&lip->li_cil, &cil->xc_cil))
			list_move_tail(&lip->li_cil, &cil->xc_cil);
	}

	spin_unlock(&cil->xc_cil_lock);

	if (tp->t_ticket->t_curr_res < 0)
		xlog_force_shutdown(log, SHUTDOWN_LOG_IO_ERROR);
}

static void
xlog_cil_free_logvec(
	struct xfs_log_vec	*log_vector)
{
	struct xfs_log_vec	*lv;

	for (lv = log_vector; lv; ) {
		struct xfs_log_vec *next = lv->lv_next;
		kmem_free(lv);
		lv = next;
	}
}

static void
xlog_discard_endio_work(
	struct work_struct	*work)
{
	struct xfs_cil_ctx	*ctx =
		container_of(work, struct xfs_cil_ctx, discard_endio_work);
	struct xfs_mount	*mp = ctx->cil->xc_log->l_mp;

	xfs_extent_busy_clear(mp, &ctx->busy_extents, false);
	kmem_free(ctx);
}

/*
 * Queue up the actual completion to a thread to avoid IRQ-safe locking for
 * pagb_lock.  Note that we need a unbounded workqueue, otherwise we might
 * get the execution delayed up to 30 seconds for weird reasons.
 */
static void
xlog_discard_endio(
	struct bio		*bio)
{
	struct xfs_cil_ctx	*ctx = bio->bi_private;

	INIT_WORK(&ctx->discard_endio_work, xlog_discard_endio_work);
	queue_work(xfs_discard_wq, &ctx->discard_endio_work);
	bio_put(bio);
}

static void
xlog_discard_busy_extents(
	struct xfs_mount	*mp,
	struct xfs_cil_ctx	*ctx)
{
	struct list_head	*list = &ctx->busy_extents;
	struct xfs_extent_busy	*busyp;
	struct bio		*bio = NULL;
	struct blk_plug		plug;
	int			error = 0;

	ASSERT(xfs_has_discard(mp));

	blk_start_plug(&plug);
	list_for_each_entry(busyp, list, list) {
		trace_xfs_discard_extent(mp, busyp->agno, busyp->bno,
					 busyp->length);

		error = __blkdev_issue_discard(mp->m_ddev_targp->bt_bdev,
				XFS_AGB_TO_DADDR(mp, busyp->agno, busyp->bno),
				XFS_FSB_TO_BB(mp, busyp->length),
				GFP_NOFS, 0, &bio);
		if (error && error != -EOPNOTSUPP) {
			xfs_info(mp,
	 "discard failed for extent [0x%llx,%u], error %d",
				 (unsigned long long)busyp->bno,
				 busyp->length,
				 error);
			break;
		}
	}

	if (bio) {
		bio->bi_private = ctx;
		bio->bi_end_io = xlog_discard_endio;
		submit_bio(bio);
	} else {
		xlog_discard_endio_work(&ctx->discard_endio_work);
	}
	blk_finish_plug(&plug);
}

/*
 * Mark all items committed and clear busy extents. We free the log vector
 * chains in a separate pass so that we unpin the log items as quickly as
 * possible.
 */
static void
xlog_cil_committed(
	struct xfs_cil_ctx	*ctx)
{
	struct xfs_mount	*mp = ctx->cil->xc_log->l_mp;
	bool			abort = xlog_is_shutdown(ctx->cil->xc_log);

	/*
	 * If the I/O failed, we're aborting the commit and already shutdown.
	 * Wake any commit waiters before aborting the log items so we don't
	 * block async log pushers on callbacks. Async log pushers explicitly do
	 * not wait on log force completion because they may be holding locks
	 * required to unpin items.
	 */
	if (abort) {
		spin_lock(&ctx->cil->xc_push_lock);
		wake_up_all(&ctx->cil->xc_start_wait);
		wake_up_all(&ctx->cil->xc_commit_wait);
		spin_unlock(&ctx->cil->xc_push_lock);
	}

	xfs_trans_committed_bulk(ctx->cil->xc_log->l_ailp, ctx->lv_chain,
					ctx->start_lsn, abort);

	xfs_extent_busy_sort(&ctx->busy_extents);
	xfs_extent_busy_clear(mp, &ctx->busy_extents,
			      xfs_has_discard(mp) && !abort);

	spin_lock(&ctx->cil->xc_push_lock);
	list_del(&ctx->committing);
	spin_unlock(&ctx->cil->xc_push_lock);

	xlog_cil_free_logvec(ctx->lv_chain);

	if (!list_empty(&ctx->busy_extents))
		xlog_discard_busy_extents(mp, ctx);
	else
		kmem_free(ctx);
}

void
xlog_cil_process_committed(
	struct list_head	*list)
{
	struct xfs_cil_ctx	*ctx;

	while ((ctx = list_first_entry_or_null(list,
			struct xfs_cil_ctx, iclog_entry))) {
		list_del(&ctx->iclog_entry);
		xlog_cil_committed(ctx);
	}
}

/*
* Record the LSN of the iclog we were just granted space to start writing into.
* If the context doesn't have a start_lsn recorded, then this iclog will
* contain the start record for the checkpoint. Otherwise this write contains
* the commit record for the checkpoint.
*/
void
xlog_cil_set_ctx_write_state(
	struct xfs_cil_ctx	*ctx,
	struct xlog_in_core	*iclog)
{
	struct xfs_cil		*cil = ctx->cil;
	xfs_lsn_t		lsn = be64_to_cpu(iclog->ic_header.h_lsn);

	ASSERT(!ctx->commit_lsn);
	if (!ctx->start_lsn) {
		spin_lock(&cil->xc_push_lock);
		/*
		 * The LSN we need to pass to the log items on transaction
		 * commit is the LSN reported by the first log vector write, not
		 * the commit lsn. If we use the commit record lsn then we can
		 * move the grant write head beyond the tail LSN and overwrite
		 * it.
		 */
		ctx->start_lsn = lsn;
		wake_up_all(&cil->xc_start_wait);
		spin_unlock(&cil->xc_push_lock);

		/*
		 * Make sure the metadata we are about to overwrite in the log
		 * has been flushed to stable storage before this iclog is
		 * issued.
		 */
		spin_lock(&cil->xc_log->l_icloglock);
		iclog->ic_flags |= XLOG_ICL_NEED_FLUSH;
		spin_unlock(&cil->xc_log->l_icloglock);
		return;
	}

	/*
	 * Take a reference to the iclog for the context so that we still hold
	 * it when xlog_write is done and has released it. This means the
	 * context controls when the iclog is released for IO.
	 */
	atomic_inc(&iclog->ic_refcnt);

	/*
	 * xlog_state_get_iclog_space() guarantees there is enough space in the
	 * iclog for an entire commit record, so we can attach the context
	 * callbacks now.  This needs to be done before we make the commit_lsn
	 * visible to waiters so that checkpoints with commit records in the
	 * same iclog order their IO completion callbacks in the same order that
	 * the commit records appear in the iclog.
	 */
	spin_lock(&cil->xc_log->l_icloglock);
	list_add_tail(&ctx->iclog_entry, &iclog->ic_callbacks);
	spin_unlock(&cil->xc_log->l_icloglock);

	/*
	 * Now we can record the commit LSN and wake anyone waiting for this
	 * sequence to have the ordered commit record assigned to a physical
	 * location in the log.
	 */
	spin_lock(&cil->xc_push_lock);
	ctx->commit_iclog = iclog;
	ctx->commit_lsn = lsn;
	wake_up_all(&cil->xc_commit_wait);
	spin_unlock(&cil->xc_push_lock);
}


/*
 * Ensure that the order of log writes follows checkpoint sequence order. This
 * relies on the context LSN being zero until the log write has guaranteed the
 * LSN that the log write will start at via xlog_state_get_iclog_space().
 */
enum _record_type {
	_START_RECORD,
	_COMMIT_RECORD,
};

static int
xlog_cil_order_write(
	struct xfs_cil		*cil,
	xfs_csn_t		sequence,
	enum _record_type	record)
{
	struct xfs_cil_ctx	*ctx;

restart:
	spin_lock(&cil->xc_push_lock);
	list_for_each_entry(ctx, &cil->xc_committing, committing) {
		/*
		 * Avoid getting stuck in this loop because we were woken by the
		 * shutdown, but then went back to sleep once already in the
		 * shutdown state.
		 */
		if (xlog_is_shutdown(cil->xc_log)) {
			spin_unlock(&cil->xc_push_lock);
			return -EIO;
		}

		/*
		 * Higher sequences will wait for this one so skip them.
		 * Don't wait for our own sequence, either.
		 */
		if (ctx->sequence >= sequence)
			continue;

		/* Wait until the LSN for the record has been recorded. */
		switch (record) {
		case _START_RECORD:
			if (!ctx->start_lsn) {
				xlog_wait(&cil->xc_start_wait, &cil->xc_push_lock);
				goto restart;
			}
			break;
		case _COMMIT_RECORD:
			if (!ctx->commit_lsn) {
				xlog_wait(&cil->xc_commit_wait, &cil->xc_push_lock);
				goto restart;
			}
			break;
		}
	}
	spin_unlock(&cil->xc_push_lock);
	return 0;
}

/*
 * Write out the log vector change now attached to the CIL context. This will
 * write a start record that needs to be strictly ordered in ascending CIL
 * sequence order so that log recovery will always use in-order start LSNs when
 * replaying checkpoints.
 */
static int
xlog_cil_write_chain(
	struct xfs_cil_ctx	*ctx,
	struct xfs_log_vec	*chain)
{
	struct xlog		*log = ctx->cil->xc_log;
	int			error;

	error = xlog_cil_order_write(ctx->cil, ctx->sequence, _START_RECORD);
	if (error)
		return error;
	return xlog_write(log, ctx, chain, ctx->ticket, XLOG_START_TRANS);
}

/*
 * Write out the commit record of a checkpoint transaction to close off a
 * running log write. These commit records are strictly ordered in ascending CIL
 * sequence order so that log recovery will always replay the checkpoints in the
 * correct order.
 */
static int
xlog_cil_write_commit_record(
	struct xfs_cil_ctx	*ctx)
{
	struct xlog		*log = ctx->cil->xc_log;
	struct xfs_log_iovec	reg = {
		.i_addr = NULL,
		.i_len = 0,
		.i_type = XLOG_REG_TYPE_COMMIT,
	};
	struct xfs_log_vec	vec = {
		.lv_niovecs = 1,
		.lv_iovecp = &reg,
	};
	int			error;

	if (xlog_is_shutdown(log))
		return -EIO;

	error = xlog_cil_order_write(ctx->cil, ctx->sequence, _COMMIT_RECORD);
	if (error)
		return error;

	error = xlog_write(log, ctx, &vec, ctx->ticket, XLOG_COMMIT_TRANS);
	if (error)
		xlog_force_shutdown(log, SHUTDOWN_LOG_IO_ERROR);
	return error;
}

/*
 * Push the Committed Item List to the log.
 *
 * If the current sequence is the same as xc_push_seq we need to do a flush. If
 * xc_push_seq is less than the current sequence, then it has already been
 * flushed and we don't need to do anything - the caller will wait for it to
 * complete if necessary.
 *
 * xc_push_seq is checked unlocked against the sequence number for a match.
 * Hence we can allow log forces to run racily and not issue pushes for the
 * same sequence twice.  If we get a race between multiple pushes for the same
 * sequence they will block on the first one and then abort, hence avoiding
 * needless pushes.
 */
static void
xlog_cil_push_work(
	struct work_struct	*work)
{
	struct xfs_cil_ctx	*ctx =
		container_of(work, struct xfs_cil_ctx, push_work);
	struct xfs_cil		*cil = ctx->cil;
	struct xlog		*log = cil->xc_log;
	struct xfs_log_vec	*lv;
	struct xfs_cil_ctx	*new_ctx;
	struct xlog_ticket	*tic;
	int			num_iovecs;
	int			error = 0;
	struct xfs_trans_header thdr;
	struct xfs_log_iovec	lhdr;
	struct xfs_log_vec	lvhdr = { NULL };
	xfs_csn_t		push_seq;
	bool			push_commit_stable;

	new_ctx = xlog_cil_ctx_alloc();
	new_ctx->ticket = xlog_cil_ticket_alloc(log);

	down_write(&cil->xc_ctx_lock);

	spin_lock(&cil->xc_push_lock);
	push_seq = cil->xc_push_seq;
	ASSERT(push_seq <= ctx->sequence);
	push_commit_stable = cil->xc_push_commit_stable;
	cil->xc_push_commit_stable = false;

	/*
	 * As we are about to switch to a new, empty CIL context, we no longer
	 * need to throttle tasks on CIL space overruns. Wake any waiters that
	 * the hard push throttle may have caught so they can start committing
	 * to the new context. The ctx->xc_push_lock provides the serialisation
	 * necessary for safely using the lockless waitqueue_active() check in
	 * this context.
	 */
	if (waitqueue_active(&cil->xc_push_wait))
		wake_up_all(&cil->xc_push_wait);

	/*
	 * Check if we've anything to push. If there is nothing, then we don't
	 * move on to a new sequence number and so we have to be able to push
	 * this sequence again later.
	 */
	if (list_empty(&cil->xc_cil)) {
		cil->xc_push_seq = 0;
		spin_unlock(&cil->xc_push_lock);
		goto out_skip;
	}


	/* check for a previously pushed sequence */
	if (push_seq < ctx->sequence) {
		spin_unlock(&cil->xc_push_lock);
		goto out_skip;
	}

	/*
	 * We are now going to push this context, so add it to the committing
	 * list before we do anything else. This ensures that anyone waiting on
	 * this push can easily detect the difference between a "push in
	 * progress" and "CIL is empty, nothing to do".
	 *
	 * IOWs, a wait loop can now check for:
	 *	the current sequence not being found on the committing list;
	 *	an empty CIL; and
	 *	an unchanged sequence number
	 * to detect a push that had nothing to do and therefore does not need
	 * waiting on. If the CIL is not empty, we get put on the committing
	 * list before emptying the CIL and bumping the sequence number. Hence
	 * an empty CIL and an unchanged sequence number means we jumped out
	 * above after doing nothing.
	 *
	 * Hence the waiter will either find the commit sequence on the
	 * committing list or the sequence number will be unchanged and the CIL
	 * still dirty. In that latter case, the push has not yet started, and
	 * so the waiter will have to continue trying to check the CIL
	 * committing list until it is found. In extreme cases of delay, the
	 * sequence may fully commit between the attempts the wait makes to wait
	 * on the commit sequence.
	 */
	list_add(&ctx->committing, &cil->xc_committing);
	spin_unlock(&cil->xc_push_lock);

	/*
	 * Pull all the log vectors off the items in the CIL, and remove the
	 * items from the CIL. We don't need the CIL lock here because it's only
	 * needed on the transaction commit side which is currently locked out
	 * by the flush lock.
	 */
	lv = NULL;
	num_iovecs = 0;
	while (!list_empty(&cil->xc_cil)) {
		struct xfs_log_item	*item;

		item = list_first_entry(&cil->xc_cil,
					struct xfs_log_item, li_cil);
		list_del_init(&item->li_cil);
		if (!ctx->lv_chain)
			ctx->lv_chain = item->li_lv;
		else
			lv->lv_next = item->li_lv;
		lv = item->li_lv;
		item->li_lv = NULL;
		num_iovecs += lv->lv_niovecs;
	}

	/*
	 * Switch the contexts so we can drop the context lock and move out
	 * of a shared context. We can't just go straight to the commit record,
	 * though - we need to synchronise with previous and future commits so
	 * that the commit records are correctly ordered in the log to ensure
	 * that we process items during log IO completion in the correct order.
	 *
	 * For example, if we get an EFI in one checkpoint and the EFD in the
	 * next (e.g. due to log forces), we do not want the checkpoint with
	 * the EFD to be committed before the checkpoint with the EFI.  Hence
	 * we must strictly order the commit records of the checkpoints so
	 * that: a) the checkpoint callbacks are attached to the iclogs in the
	 * correct order; and b) the checkpoints are replayed in correct order
	 * in log recovery.
	 *
	 * Hence we need to add this context to the committing context list so
	 * that higher sequences will wait for us to write out a commit record
	 * before they do.
	 *
	 * xfs_log_force_seq requires us to mirror the new sequence into the cil
	 * structure atomically with the addition of this sequence to the
	 * committing list. This also ensures that we can do unlocked checks
	 * against the current sequence in log forces without risking
	 * deferencing a freed context pointer.
	 */
	spin_lock(&cil->xc_push_lock);
	xlog_cil_ctx_switch(cil, new_ctx);
	spin_unlock(&cil->xc_push_lock);
	up_write(&cil->xc_ctx_lock);

	/*
	 * Build a checkpoint transaction header and write it to the log to
	 * begin the transaction. We need to account for the space used by the
	 * transaction header here as it is not accounted for in xlog_write().
	 *
	 * The LSN we need to pass to the log items on transaction commit is
	 * the LSN reported by the first log vector write. If we use the commit
	 * record lsn then we can move the tail beyond the grant write head.
	 */
	tic = ctx->ticket;
	thdr.th_magic = XFS_TRANS_HEADER_MAGIC;
	thdr.th_type = XFS_TRANS_CHECKPOINT;
	thdr.th_tid = tic->t_tid;
	thdr.th_num_items = num_iovecs;
	lhdr.i_addr = &thdr;
	lhdr.i_len = sizeof(xfs_trans_header_t);
	lhdr.i_type = XLOG_REG_TYPE_TRANSHDR;
	tic->t_curr_res -= lhdr.i_len + sizeof(xlog_op_header_t);

	lvhdr.lv_niovecs = 1;
	lvhdr.lv_iovecp = &lhdr;
	lvhdr.lv_next = ctx->lv_chain;

	error = xlog_cil_write_chain(ctx, &lvhdr);
	if (error)
		goto out_abort_free_ticket;

	error = xlog_cil_write_commit_record(ctx);
	if (error)
		goto out_abort_free_ticket;

	xfs_log_ticket_ungrant(log, tic);

	/*
	 * If the checkpoint spans multiple iclogs, wait for all previous iclogs
	 * to complete before we submit the commit_iclog. We can't use state
	 * checks for this - ACTIVE can be either a past completed iclog or a
	 * future iclog being filled, while WANT_SYNC through SYNC_DONE can be a
	 * past or future iclog awaiting IO or ordered IO completion to be run.
	 * In the latter case, if it's a future iclog and we wait on it, the we
	 * will hang because it won't get processed through to ic_force_wait
	 * wakeup until this commit_iclog is written to disk.  Hence we use the
	 * iclog header lsn and compare it to the commit lsn to determine if we
	 * need to wait on iclogs or not.
	 */
	spin_lock(&log->l_icloglock);
	if (ctx->start_lsn != ctx->commit_lsn) {
		xfs_lsn_t	plsn;

		plsn = be64_to_cpu(ctx->commit_iclog->ic_prev->ic_header.h_lsn);
		if (plsn && XFS_LSN_CMP(plsn, ctx->commit_lsn) < 0) {
			/*
			 * Waiting on ic_force_wait orders the completion of
			 * iclogs older than ic_prev. Hence we only need to wait
			 * on the most recent older iclog here.
			 */
			xlog_wait_on_iclog(ctx->commit_iclog->ic_prev);
			spin_lock(&log->l_icloglock);
		}

		/*
		 * We need to issue a pre-flush so that the ordering for this
		 * checkpoint is correctly preserved down to stable storage.
		 */
		ctx->commit_iclog->ic_flags |= XLOG_ICL_NEED_FLUSH;
	}

	/*
	 * The commit iclog must be written to stable storage to guarantee
	 * journal IO vs metadata writeback IO is correctly ordered on stable
	 * storage.
	 *
	 * If the push caller needs the commit to be immediately stable and the
	 * commit_iclog is not yet marked as XLOG_STATE_WANT_SYNC to indicate it
	 * will be written when released, switch it's state to WANT_SYNC right
	 * now.
	 */
	ctx->commit_iclog->ic_flags |= XLOG_ICL_NEED_FUA;
	if (push_commit_stable &&
	    ctx->commit_iclog->ic_state == XLOG_STATE_ACTIVE)
		xlog_state_switch_iclogs(log, ctx->commit_iclog, 0);
	xlog_state_release_iclog(log, ctx->commit_iclog);

	/* Not safe to reference ctx now! */

	spin_unlock(&log->l_icloglock);
	return;

out_skip:
	up_write(&cil->xc_ctx_lock);
	xfs_log_ticket_put(new_ctx->ticket);
	kmem_free(new_ctx);
	return;

out_abort_free_ticket:
	xfs_log_ticket_ungrant(log, tic);
	ASSERT(xlog_is_shutdown(log));
	if (!ctx->commit_iclog) {
		xlog_cil_committed(ctx);
		return;
	}
	spin_lock(&log->l_icloglock);
	xlog_state_release_iclog(log, ctx->commit_iclog);
	/* Not safe to reference ctx now! */
	spin_unlock(&log->l_icloglock);
}

/*
 * We need to push CIL every so often so we don't cache more than we can fit in
 * the log. The limit really is that a checkpoint can't be more than half the
 * log (the current checkpoint is not allowed to overwrite the previous
 * checkpoint), but commit latency and memory usage limit this to a smaller
 * size.
 */
static void
xlog_cil_push_background(
	struct xlog	*log) __releases(cil->xc_ctx_lock)
{
	struct xfs_cil	*cil = log->l_cilp;

	/*
	 * The cil won't be empty because we are called while holding the
	 * context lock so whatever we added to the CIL will still be there
	 */
	ASSERT(!list_empty(&cil->xc_cil));

	/*
	 * Don't do a background push if we haven't used up all the
	 * space available yet.
	 */
	if (cil->xc_ctx->space_used < XLOG_CIL_SPACE_LIMIT(log)) {
		up_read(&cil->xc_ctx_lock);
		return;
	}

	spin_lock(&cil->xc_push_lock);
	if (cil->xc_push_seq < cil->xc_current_sequence) {
		cil->xc_push_seq = cil->xc_current_sequence;
		queue_work(cil->xc_push_wq, &cil->xc_ctx->push_work);
	}

	/*
	 * Drop the context lock now, we can't hold that if we need to sleep
	 * because we are over the blocking threshold. The push_lock is still
	 * held, so blocking threshold sleep/wakeup is still correctly
	 * serialised here.
	 */
	up_read(&cil->xc_ctx_lock);

	/*
	 * If we are well over the space limit, throttle the work that is being
	 * done until the push work on this context has begun. Enforce the hard
	 * throttle on all transaction commits once it has been activated, even
	 * if the committing transactions have resulted in the space usage
	 * dipping back down under the hard limit.
	 *
	 * The ctx->xc_push_lock provides the serialisation necessary for safely
	 * using the lockless waitqueue_active() check in this context.
	 */
	if (cil->xc_ctx->space_used >= XLOG_CIL_BLOCKING_SPACE_LIMIT(log) ||
	    waitqueue_active(&cil->xc_push_wait)) {
		trace_xfs_log_cil_wait(log, cil->xc_ctx->ticket);
		ASSERT(cil->xc_ctx->space_used < log->l_logsize);
		xlog_wait(&cil->xc_push_wait, &cil->xc_push_lock);
		return;
	}

	spin_unlock(&cil->xc_push_lock);

}

/*
 * xlog_cil_push_now() is used to trigger an immediate CIL push to the sequence
 * number that is passed. When it returns, the work will be queued for
 * @push_seq, but it won't be completed.
 *
 * If the caller is performing a synchronous force, we will flush the workqueue
 * to get previously queued work moving to minimise the wait time they will
 * undergo waiting for all outstanding pushes to complete. The caller is
 * expected to do the required waiting for push_seq to complete.
 *
 * If the caller is performing an async push, we need to ensure that the
 * checkpoint is fully flushed out of the iclogs when we finish the push. If we
 * don't do this, then the commit record may remain sitting in memory in an
 * ACTIVE iclog. This then requires another full log force to push to disk,
 * which defeats the purpose of having an async, non-blocking CIL force
 * mechanism. Hence in this case we need to pass a flag to the push work to
 * indicate it needs to flush the commit record itself.
 */
static void
xlog_cil_push_now(
	struct xlog	*log,
	xfs_lsn_t	push_seq,
	bool		async)
{
	struct xfs_cil	*cil = log->l_cilp;

	if (!cil)
		return;

	ASSERT(push_seq && push_seq <= cil->xc_current_sequence);

	/* start on any pending background push to minimise wait time on it */
	if (!async)
		flush_workqueue(cil->xc_push_wq);

	spin_lock(&cil->xc_push_lock);

	/*
	 * If this is an async flush request, we always need to set the
	 * xc_push_commit_stable flag even if something else has already queued
	 * a push. The flush caller is asking for the CIL to be on stable
	 * storage when the next push completes, so regardless of who has queued
	 * the push, the flush requires stable semantics from it.
	 */
	cil->xc_push_commit_stable = async;

	/*
	 * If the CIL is empty or we've already pushed the sequence then
	 * there's no more work that we need to do.
	 */
	if (list_empty(&cil->xc_cil) || push_seq <= cil->xc_push_seq) {
		spin_unlock(&cil->xc_push_lock);
		return;
	}

	cil->xc_push_seq = push_seq;
	queue_work(cil->xc_push_wq, &cil->xc_ctx->push_work);
	spin_unlock(&cil->xc_push_lock);
}

bool
xlog_cil_empty(
	struct xlog	*log)
{
	struct xfs_cil	*cil = log->l_cilp;
	bool		empty = false;

	spin_lock(&cil->xc_push_lock);
	if (list_empty(&cil->xc_cil))
		empty = true;
	spin_unlock(&cil->xc_push_lock);
	return empty;
}

/*
 * Commit a transaction with the given vector to the Committed Item List.
 *
 * To do this, we need to format the item, pin it in memory if required and
 * account for the space used by the transaction. Once we have done that we
 * need to release the unused reservation for the transaction, attach the
 * transaction to the checkpoint context so we carry the busy extents through
 * to checkpoint completion, and then unlock all the items in the transaction.
 *
 * Called with the context lock already held in read mode to lock out
 * background commit, returns without it held once background commits are
 * allowed again.
 */
void
xlog_cil_commit(
	struct xlog		*log,
	struct xfs_trans	*tp,
	xfs_csn_t		*commit_seq,
	bool			regrant)
{
	struct xfs_cil		*cil = log->l_cilp;
	struct xfs_log_item	*lip, *next;

	/*
	 * Do all necessary memory allocation before we lock the CIL.
	 * This ensures the allocation does not deadlock with a CIL
	 * push in memory reclaim (e.g. from kswapd).
	 */
	xlog_cil_alloc_shadow_bufs(log, tp);

	/* lock out background commit */
	down_read(&cil->xc_ctx_lock);

	xlog_cil_insert_items(log, tp);

	if (regrant && !xlog_is_shutdown(log))
		xfs_log_ticket_regrant(log, tp->t_ticket);
	else
		xfs_log_ticket_ungrant(log, tp->t_ticket);
	tp->t_ticket = NULL;
	xfs_trans_unreserve_and_mod_sb(tp);

	/*
	 * Once all the items of the transaction have been copied to the CIL,
	 * the items can be unlocked and possibly freed.
	 *
	 * This needs to be done before we drop the CIL context lock because we
	 * have to update state in the log items and unlock them before they go
	 * to disk. If we don't, then the CIL checkpoint can race with us and
	 * we can run checkpoint completion before we've updated and unlocked
	 * the log items. This affects (at least) processing of stale buffers,
	 * inodes and EFIs.
	 */
	trace_xfs_trans_commit_items(tp, _RET_IP_);
	list_for_each_entry_safe(lip, next, &tp->t_items, li_trans) {
		xfs_trans_del_item(lip);
		if (lip->li_ops->iop_committing)
			lip->li_ops->iop_committing(lip, cil->xc_ctx->sequence);
	}
	if (commit_seq)
		*commit_seq = cil->xc_ctx->sequence;

	/* xlog_cil_push_background() releases cil->xc_ctx_lock */
	xlog_cil_push_background(log);
}

/*
 * Flush the CIL to stable storage but don't wait for it to complete. This
 * requires the CIL push to ensure the commit record for the push hits the disk,
 * but otherwise is no different to a push done from a log force.
 */
void
xlog_cil_flush(
	struct xlog	*log)
{
	xfs_csn_t	seq = log->l_cilp->xc_current_sequence;

	trace_xfs_log_force(log->l_mp, seq, _RET_IP_);
	xlog_cil_push_now(log, seq, true);

	/*
	 * If the CIL is empty, make sure that any previous checkpoint that may
	 * still be in an active iclog is pushed to stable storage.
	 */
	if (list_empty(&log->l_cilp->xc_cil))
		xfs_log_force(log->l_mp, 0);
}

/*
 * Conditionally push the CIL based on the sequence passed in.
 *
 * We only need to push if we haven't already pushed the sequence number given.
 * Hence the only time we will trigger a push here is if the push sequence is
 * the same as the current context.
 *
 * We return the current commit lsn to allow the callers to determine if a
 * iclog flush is necessary following this call.
 */
xfs_lsn_t
xlog_cil_force_seq(
	struct xlog	*log,
	xfs_csn_t	sequence)
{
	struct xfs_cil		*cil = log->l_cilp;
	struct xfs_cil_ctx	*ctx;
	xfs_lsn_t		commit_lsn = NULLCOMMITLSN;

	ASSERT(sequence <= cil->xc_current_sequence);

	if (!sequence)
		sequence = cil->xc_current_sequence;
	trace_xfs_log_force(log->l_mp, sequence, _RET_IP_);

	/*
	 * check to see if we need to force out the current context.
	 * xlog_cil_push() handles racing pushes for the same sequence,
	 * so no need to deal with it here.
	 */
restart:
	xlog_cil_push_now(log, sequence, false);

	/*
	 * See if we can find a previous sequence still committing.
	 * We need to wait for all previous sequence commits to complete
	 * before allowing the force of push_seq to go ahead. Hence block
	 * on commits for those as well.
	 */
	spin_lock(&cil->xc_push_lock);
	list_for_each_entry(ctx, &cil->xc_committing, committing) {
		/*
		 * Avoid getting stuck in this loop because we were woken by the
		 * shutdown, but then went back to sleep once already in the
		 * shutdown state.
		 */
		if (xlog_is_shutdown(log))
			goto out_shutdown;
		if (ctx->sequence > sequence)
			continue;
		if (!ctx->commit_lsn) {
			/*
			 * It is still being pushed! Wait for the push to
			 * complete, then start again from the beginning.
			 */
			XFS_STATS_INC(log->l_mp, xs_log_force_sleep);
			xlog_wait(&cil->xc_commit_wait, &cil->xc_push_lock);
			goto restart;
		}
		if (ctx->sequence != sequence)
			continue;
		/* found it! */
		commit_lsn = ctx->commit_lsn;
	}

	/*
	 * The call to xlog_cil_push_now() executes the push in the background.
	 * Hence by the time we have got here it our sequence may not have been
	 * pushed yet. This is true if the current sequence still matches the
	 * push sequence after the above wait loop and the CIL still contains
	 * dirty objects. This is guaranteed by the push code first adding the
	 * context to the committing list before emptying the CIL.
	 *
	 * Hence if we don't find the context in the committing list and the
	 * current sequence number is unchanged then the CIL contents are
	 * significant.  If the CIL is empty, if means there was nothing to push
	 * and that means there is nothing to wait for. If the CIL is not empty,
	 * it means we haven't yet started the push, because if it had started
	 * we would have found the context on the committing list.
	 */
	if (sequence == cil->xc_current_sequence &&
	    !list_empty(&cil->xc_cil)) {
		spin_unlock(&cil->xc_push_lock);
		goto restart;
	}

	spin_unlock(&cil->xc_push_lock);
	return commit_lsn;

	/*
	 * We detected a shutdown in progress. We need to trigger the log force
	 * to pass through it's iclog state machine error handling, even though
	 * we are already in a shutdown state. Hence we can't return
	 * NULLCOMMITLSN here as that has special meaning to log forces (i.e.
	 * LSN is already stable), so we return a zero LSN instead.
	 */
out_shutdown:
	spin_unlock(&cil->xc_push_lock);
	return 0;
}

/*
 * Check if the current log item was first committed in this sequence.
 * We can't rely on just the log item being in the CIL, we have to check
 * the recorded commit sequence number.
 *
 * Note: for this to be used in a non-racy manner, it has to be called with
 * CIL flushing locked out. As a result, it should only be used during the
 * transaction commit process when deciding what to format into the item.
 */
bool
xfs_log_item_in_current_chkpt(
	struct xfs_log_item	*lip)
{
	struct xfs_cil		*cil = lip->li_log->l_cilp;

	if (list_empty(&lip->li_cil))
		return false;

	/*
	 * li_seq is written on the first commit of a log item to record the
	 * first checkpoint it is written to. Hence if it is different to the
	 * current sequence, we're in a new checkpoint.
	 */
	return lip->li_seq == READ_ONCE(cil->xc_current_sequence);
}

/*
 * Perform initial CIL structure initialisation.
 */
int
xlog_cil_init(
	struct xlog	*log)
{
	struct xfs_cil	*cil;
	struct xfs_cil_ctx *ctx;

	cil = kmem_zalloc(sizeof(*cil), KM_MAYFAIL);
	if (!cil)
		return -ENOMEM;
	/*
	 * Limit the CIL pipeline depth to 4 concurrent works to bound the
	 * concurrency the log spinlocks will be exposed to.
	 */
	cil->xc_push_wq = alloc_workqueue("xfs-cil/%s",
			XFS_WQFLAGS(WQ_FREEZABLE | WQ_MEM_RECLAIM | WQ_UNBOUND),
			4, log->l_mp->m_super->s_id);
	if (!cil->xc_push_wq)
		goto out_destroy_cil;

	INIT_LIST_HEAD(&cil->xc_cil);
	INIT_LIST_HEAD(&cil->xc_committing);
	spin_lock_init(&cil->xc_cil_lock);
	spin_lock_init(&cil->xc_push_lock);
	init_waitqueue_head(&cil->xc_push_wait);
	init_rwsem(&cil->xc_ctx_lock);
	init_waitqueue_head(&cil->xc_start_wait);
	init_waitqueue_head(&cil->xc_commit_wait);
	cil->xc_log = log;
	log->l_cilp = cil;

	ctx = xlog_cil_ctx_alloc();
	xlog_cil_ctx_switch(cil, ctx);

	return 0;

out_destroy_cil:
	kmem_free(cil);
	return -ENOMEM;
}

void
xlog_cil_destroy(
	struct xlog	*log)
{
	if (log->l_cilp->xc_ctx) {
		if (log->l_cilp->xc_ctx->ticket)
			xfs_log_ticket_put(log->l_cilp->xc_ctx->ticket);
		kmem_free(log->l_cilp->xc_ctx);
	}

	ASSERT(list_empty(&log->l_cilp->xc_cil));
	destroy_workqueue(log->l_cilp->xc_push_wq);
	kmem_free(log->l_cilp);
}