/*P:010 * A hypervisor allows multiple Operating Systems to run on a single machine. * To quote David Wheeler: "Any problem in computer science can be solved with * another layer of indirection." * * We keep things simple in two ways. First, we start with a normal Linux * kernel and insert a module (lg.ko) which allows us to run other Linux * kernels the same way we'd run processes. We call the first kernel the Host, * and the others the Guests. The program which sets up and configures Guests * (such as the example in Documentation/lguest/lguest.c) is called the * Launcher. * * Secondly, we only run specially modified Guests, not normal kernels. When * you set CONFIG_LGUEST to 'y' or 'm', this automatically sets * CONFIG_LGUEST_GUEST=y, which compiles this file into the kernel so it knows * how to be a Guest. This means that you can use the same kernel you boot * normally (ie. as a Host) as a Guest. * * These Guests know that they cannot do privileged operations, such as disable * interrupts, and that they have to ask the Host to do such things explicitly. * This file consists of all the replacements for such low-level native * hardware operations: these special Guest versions call the Host. * * So how does the kernel know it's a Guest? The Guest starts at a special * entry point marked with a magic string, which sets up a few things then * calls here. We replace the native functions various "paravirt" structures * with our Guest versions, then boot like normal. :*/ /* * Copyright (C) 2006, Rusty Russell IBM Corporation. * * This program is free software; you can redistribute it and/or modify * it under the terms of the GNU General Public License as published by * the Free Software Foundation; either version 2 of the License, or * (at your option) any later version. * * This program is distributed in the hope that it will be useful, but * WITHOUT ANY WARRANTY; without even the implied warranty of * MERCHANTABILITY OR FITNESS FOR A PARTICULAR PURPOSE, GOOD TITLE or * NON INFRINGEMENT. See the GNU General Public License for more * details. * * You should have received a copy of the GNU General Public License * along with this program; if not, write to the Free Software * Foundation, Inc., 675 Mass Ave, Cambridge, MA 02139, USA. */ #include #include #include #include #include #include #include #include #include #include #include #include #include #include #include #include #include #include #include #include #include /*G:010 Welcome to the Guest! * * The Guest in our tale is a simple creature: identical to the Host but * behaving in simplified but equivalent ways. In particular, the Guest is the * same kernel as the Host (or at least, built from the same source code). :*/ /* Declarations for definitions in lguest_guest.S */ extern char lguest_noirq_start[], lguest_noirq_end[]; extern const char lgstart_cli[], lgend_cli[]; extern const char lgstart_sti[], lgend_sti[]; extern const char lgstart_popf[], lgend_popf[]; extern const char lgstart_pushf[], lgend_pushf[]; extern const char lgstart_iret[], lgend_iret[]; extern void lguest_iret(void); struct lguest_data lguest_data = { .hcall_status = { [0 ... LHCALL_RING_SIZE-1] = 0xFF }, .noirq_start = (u32)lguest_noirq_start, .noirq_end = (u32)lguest_noirq_end, .blocked_interrupts = { 1 }, /* Block timer interrupts */ }; static cycle_t clock_base; /*G:035 Notice the lazy_hcall() above, rather than hcall(). This is our first * real optimization trick! * * When lazy_mode is set, it means we're allowed to defer all hypercalls and do * them as a batch when lazy_mode is eventually turned off. Because hypercalls * are reasonably expensive, batching them up makes sense. For example, a * large mmap might update dozens of page table entries: that code calls * paravirt_enter_lazy_mmu(), does the dozen updates, then calls * lguest_leave_lazy_mode(). * * So, when we're in lazy mode, we call async_hypercall() to store the call for * future processing. When lazy mode is turned off we issue a hypercall to * flush the stored calls. */ static void lguest_leave_lazy_mode(void) { paravirt_leave_lazy(paravirt_get_lazy_mode()); hcall(LHCALL_FLUSH_ASYNC, 0, 0, 0); } static void lazy_hcall(unsigned long call, unsigned long arg1, unsigned long arg2, unsigned long arg3) { if (paravirt_get_lazy_mode() == PARAVIRT_LAZY_NONE) hcall(call, arg1, arg2, arg3); else async_hcall(call, arg1, arg2, arg3); } /* async_hcall() is pretty simple: I'm quite proud of it really. We have a * ring buffer of stored hypercalls which the Host will run though next time we * do a normal hypercall. Each entry in the ring has 4 slots for the hypercall * arguments, and a "hcall_status" word which is 0 if the call is ready to go, * and 255 once the Host has finished with it. * * If we come around to a slot which hasn't been finished, then the table is * full and we just make the hypercall directly. This has the nice side * effect of causing the Host to run all the stored calls in the ring buffer * which empties it for next time! */ void async_hcall(unsigned long call, unsigned long arg1, unsigned long arg2, unsigned long arg3) { /* Note: This code assumes we're uniprocessor. */ static unsigned int next_call; unsigned long flags; /* Disable interrupts if not already disabled: we don't want an * interrupt handler making a hypercall while we're already doing * one! */ local_irq_save(flags); if (lguest_data.hcall_status[next_call] != 0xFF) { /* Table full, so do normal hcall which will flush table. */ hcall(call, arg1, arg2, arg3); } else { lguest_data.hcalls[next_call].eax = call; lguest_data.hcalls[next_call].edx = arg1; lguest_data.hcalls[next_call].ebx = arg2; lguest_data.hcalls[next_call].ecx = arg3; /* Arguments must all be written before we mark it to go */ wmb(); lguest_data.hcall_status[next_call] = 0; if (++next_call == LHCALL_RING_SIZE) next_call = 0; } local_irq_restore(flags); } /*:*/ /* Wrappers for the SEND_DMA and BIND_DMA hypercalls. This is mainly because * Jeff Garzik complained that __pa() should never appear in drivers, and this * helps remove most of them. But also, it wraps some ugliness. */ void lguest_send_dma(unsigned long key, struct lguest_dma *dma) { /* The hcall might not write this if something goes wrong */ dma->used_len = 0; hcall(LHCALL_SEND_DMA, key, __pa(dma), 0); } int lguest_bind_dma(unsigned long key, struct lguest_dma *dmas, unsigned int num, u8 irq) { /* This is the only hypercall which actually wants 5 arguments, and we * only support 4. Fortunately the interrupt number is always less * than 256, so we can pack it with the number of dmas in the final * argument. */ if (!hcall(LHCALL_BIND_DMA, key, __pa(dmas), (num << 8) | irq)) return -ENOMEM; return 0; } /* Unbinding is the same hypercall as binding, but with 0 num & irq. */ void lguest_unbind_dma(unsigned long key, struct lguest_dma *dmas) { hcall(LHCALL_BIND_DMA, key, __pa(dmas), 0); } /* For guests, device memory can be used as normal memory, so we cast away the * __iomem to quieten sparse. */ void *lguest_map(unsigned long phys_addr, unsigned long pages) { return (__force void *)ioremap(phys_addr, PAGE_SIZE*pages); } void lguest_unmap(void *addr) { iounmap((__force void __iomem *)addr); } /*G:033 * Here are our first native-instruction replacements: four functions for * interrupt control. * * The simplest way of implementing these would be to have "turn interrupts * off" and "turn interrupts on" hypercalls. Unfortunately, this is too slow: * these are by far the most commonly called functions of those we override. * * So instead we keep an "irq_enabled" field inside our "struct lguest_data", * which the Guest can update with a single instruction. The Host knows to * check there when it wants to deliver an interrupt. */ /* save_flags() is expected to return the processor state (ie. "eflags"). The * eflags word contains all kind of stuff, but in practice Linux only cares * about the interrupt flag. Our "save_flags()" just returns that. */ static unsigned long save_fl(void) { return lguest_data.irq_enabled; } /* "restore_flags" just sets the flags back to the value given. */ static void restore_fl(unsigned long flags) { lguest_data.irq_enabled = flags; } /* Interrupts go off... */ static void irq_disable(void) { lguest_data.irq_enabled = 0; } /* Interrupts go on... */ static void irq_enable(void) { lguest_data.irq_enabled = X86_EFLAGS_IF; } /*:*/ /*M:003 Note that we don't check for outstanding interrupts when we re-enable * them (or when we unmask an interrupt). This seems to work for the moment, * since interrupts are rare and we'll just get the interrupt on the next timer * tick, but when we turn on CONFIG_NO_HZ, we should revisit this. One way * would be to put the "irq_enabled" field in a page by itself, and have the * Host write-protect it when an interrupt comes in when irqs are disabled. * There will then be a page fault as soon as interrupts are re-enabled. :*/ /*G:034 * The Interrupt Descriptor Table (IDT). * * The IDT tells the processor what to do when an interrupt comes in. Each * entry in the table is a 64-bit descriptor: this holds the privilege level, * address of the handler, and... well, who cares? The Guest just asks the * Host to make the change anyway, because the Host controls the real IDT. */ static void lguest_write_idt_entry(struct desc_struct *dt, int entrynum, u32 low, u32 high) { /* Keep the local copy up to date. */ write_dt_entry(dt, entrynum, low, high); /* Tell Host about this new entry. */ hcall(LHCALL_LOAD_IDT_ENTRY, entrynum, low, high); } /* Changing to a different IDT is very rare: we keep the IDT up-to-date every * time it is written, so we can simply loop through all entries and tell the * Host about them. */ static void lguest_load_idt(const struct Xgt_desc_struct *desc) { unsigned int i; struct desc_struct *idt = (void *)desc->address; for (i = 0; i < (desc->size+1)/8; i++) hcall(LHCALL_LOAD_IDT_ENTRY, i, idt[i].a, idt[i].b); } /* * The Global Descriptor Table. * * The Intel architecture defines another table, called the Global Descriptor * Table (GDT). You tell the CPU where it is (and its size) using the "lgdt" * instruction, and then several other instructions refer to entries in the * table. There are three entries which the Switcher needs, so the Host simply * controls the entire thing and the Guest asks it to make changes using the * LOAD_GDT hypercall. * * This is the opposite of the IDT code where we have a LOAD_IDT_ENTRY * hypercall and use that repeatedly to load a new IDT. I don't think it * really matters, but wouldn't it be nice if they were the same? */ static void lguest_load_gdt(const struct Xgt_desc_struct *desc) { BUG_ON((desc->size+1)/8 != GDT_ENTRIES); hcall(LHCALL_LOAD_GDT, __pa(desc->address), GDT_ENTRIES, 0); } /* For a single GDT entry which changes, we do the lazy thing: alter our GDT, * then tell the Host to reload the entire thing. This operation is so rare * that this naive implementation is reasonable. */ static void lguest_write_gdt_entry(struct desc_struct *dt, int entrynum, u32 low, u32 high) { write_dt_entry(dt, entrynum, low, high); hcall(LHCALL_LOAD_GDT, __pa(dt), GDT_ENTRIES, 0); } /* OK, I lied. There are three "thread local storage" GDT entries which change * on every context switch (these three entries are how glibc implements * __thread variables). So we have a hypercall specifically for this case. */ static void lguest_load_tls(struct thread_struct *t, unsigned int cpu) { /* There's one problem which normal hardware doesn't have: the Host * can't handle us removing entries we're currently using. So we clear * the GS register here: if it's needed it'll be reloaded anyway. */ loadsegment(gs, 0); lazy_hcall(LHCALL_LOAD_TLS, __pa(&t->tls_array), cpu, 0); } /*G:038 That's enough excitement for now, back to ploughing through each of * the different pv_ops structures (we're about 1/3 of the way through). * * This is the Local Descriptor Table, another weird Intel thingy. Linux only * uses this for some strange applications like Wine. We don't do anything * here, so they'll get an informative and friendly Segmentation Fault. */ static void lguest_set_ldt(const void *addr, unsigned entries) { } /* This loads a GDT entry into the "Task Register": that entry points to a * structure called the Task State Segment. Some comments scattered though the * kernel code indicate that this used for task switching in ages past, along * with blood sacrifice and astrology. * * Now there's nothing interesting in here that we don't get told elsewhere. * But the native version uses the "ltr" instruction, which makes the Host * complain to the Guest about a Segmentation Fault and it'll oops. So we * override the native version with a do-nothing version. */ static void lguest_load_tr_desc(void) { } /* The "cpuid" instruction is a way of querying both the CPU identity * (manufacturer, model, etc) and its features. It was introduced before the * Pentium in 1993 and keeps getting extended by both Intel and AMD. As you * might imagine, after a decade and a half this treatment, it is now a giant * ball of hair. Its entry in the current Intel manual runs to 28 pages. * * This instruction even it has its own Wikipedia entry. The Wikipedia entry * has been translated into 4 languages. I am not making this up! * * We could get funky here and identify ourselves as "GenuineLguest", but * instead we just use the real "cpuid" instruction. Then I pretty much turned * off feature bits until the Guest booted. (Don't say that: you'll damage * lguest sales!) Shut up, inner voice! (Hey, just pointing out that this is * hardly future proof.) Noone's listening! They don't like you anyway, * parenthetic weirdo! * * Replacing the cpuid so we can turn features off is great for the kernel, but * anyone (including userspace) can just use the raw "cpuid" instruction and * the Host won't even notice since it isn't privileged. So we try not to get * too worked up about it. */ static void lguest_cpuid(unsigned int *eax, unsigned int *ebx, unsigned int *ecx, unsigned int *edx) { int function = *eax; native_cpuid(eax, ebx, ecx, edx); switch (function) { case 1: /* Basic feature request. */ /* We only allow kernel to see SSE3, CMPXCHG16B and SSSE3 */ *ecx &= 0x00002201; /* SSE, SSE2, FXSR, MMX, CMOV, CMPXCHG8B, FPU. */ *edx &= 0x07808101; /* The Host can do a nice optimization if it knows that the * kernel mappings (addresses above 0xC0000000 or whatever * PAGE_OFFSET is set to) haven't changed. But Linux calls * flush_tlb_user() for both user and kernel mappings unless * the Page Global Enable (PGE) feature bit is set. */ *edx |= 0x00002000; break; case 0x80000000: /* Futureproof this a little: if they ask how much extended * processor information there is, limit it to known fields. */ if (*eax > 0x80000008) *eax = 0x80000008; break; } } /* Intel has four control registers, imaginatively named cr0, cr2, cr3 and cr4. * I assume there's a cr1, but it hasn't bothered us yet, so we'll not bother * it. The Host needs to know when the Guest wants to change them, so we have * a whole series of functions like read_cr0() and write_cr0(). * * We start with CR0. CR0 allows you to turn on and off all kinds of basic * features, but Linux only really cares about one: the horrifically-named Task * Switched (TS) bit at bit 3 (ie. 8) * * What does the TS bit do? Well, it causes the CPU to trap (interrupt 7) if * the floating point unit is used. Which allows us to restore FPU state * lazily after a task switch, and Linux uses that gratefully, but wouldn't a * name like "FPUTRAP bit" be a little less cryptic? * * We store cr0 (and cr3) locally, because the Host never changes it. The * Guest sometimes wants to read it and we'd prefer not to bother the Host * unnecessarily. */ static unsigned long current_cr0, current_cr3; static void lguest_write_cr0(unsigned long val) { /* 8 == TS bit. */ lazy_hcall(LHCALL_TS, val & 8, 0, 0); current_cr0 = val; } static unsigned long lguest_read_cr0(void) { return current_cr0; } /* Intel provided a special instruction to clear the TS bit for people too cool * to use write_cr0() to do it. This "clts" instruction is faster, because all * the vowels have been optimized out. */ static void lguest_clts(void) { lazy_hcall(LHCALL_TS, 0, 0, 0); current_cr0 &= ~8U; } /* CR2 is the virtual address of the last page fault, which the Guest only ever * reads. The Host kindly writes this into our "struct lguest_data", so we * just read it out of there. */ static unsigned long lguest_read_cr2(void) { return lguest_data.cr2; } /* CR3 is the current toplevel pagetable page: the principle is the same as * cr0. Keep a local copy, and tell the Host when it changes. */ static void lguest_write_cr3(unsigned long cr3) { lazy_hcall(LHCALL_NEW_PGTABLE, cr3, 0, 0); current_cr3 = cr3; } static unsigned long lguest_read_cr3(void) { return current_cr3; } /* CR4 is used to enable and disable PGE, but we don't care. */ static unsigned long lguest_read_cr4(void) { return 0; } static void lguest_write_cr4(unsigned long val) { } /* * Page Table Handling. * * Now would be a good time to take a rest and grab a coffee or similarly * relaxing stimulant. The easy parts are behind us, and the trek gradually * winds uphill from here. * * Quick refresher: memory is divided into "pages" of 4096 bytes each. The CPU * maps virtual addresses to physical addresses using "page tables". We could * use one huge index of 1 million entries: each address is 4 bytes, so that's * 1024 pages just to hold the page tables. But since most virtual addresses * are unused, we use a two level index which saves space. The CR3 register * contains the physical address of the top level "page directory" page, which * contains physical addresses of up to 1024 second-level pages. Each of these * second level pages contains up to 1024 physical addresses of actual pages, * or Page Table Entries (PTEs). * * Here's a diagram, where arrows indicate physical addresses: * * CR3 ---> +---------+ * | --------->+---------+ * | | | PADDR1 | * Top-level | | PADDR2 | * (PMD) page | | | * | | Lower-level | * | | (PTE) page | * | | | | * .... .... * * So to convert a virtual address to a physical address, we look up the top * level, which points us to the second level, which gives us the physical * address of that page. If the top level entry was not present, or the second * level entry was not present, then the virtual address is invalid (we * say "the page was not mapped"). * * Put another way, a 32-bit virtual address is divided up like so: * * 1 1 0 0 0 0 0 0 0 0 0 1 0 0 0 0 0 0 0 0 0 0 0 0 0 0 0 0 0 0 0 0 * |<---- 10 bits ---->|<---- 10 bits ---->|<------ 12 bits ------>| * Index into top Index into second Offset within page * page directory page pagetable page * * The kernel spends a lot of time changing both the top-level page directory * and lower-level pagetable pages. The Guest doesn't know physical addresses, * so while it maintains these page tables exactly like normal, it also needs * to keep the Host informed whenever it makes a change: the Host will create * the real page tables based on the Guests'. */ /* The Guest calls this to set a second-level entry (pte), ie. to map a page * into a process' address space. We set the entry then tell the Host the * toplevel and address this corresponds to. The Guest uses one pagetable per * process, so we need to tell the Host which one we're changing (mm->pgd). */ static void lguest_set_pte_at(struct mm_struct *mm, unsigned long addr, pte_t *ptep, pte_t pteval) { *ptep = pteval; lazy_hcall(LHCALL_SET_PTE, __pa(mm->pgd), addr, pteval.pte_low); } /* The Guest calls this to set a top-level entry. Again, we set the entry then * tell the Host which top-level page we changed, and the index of the entry we * changed. */ static void lguest_set_pmd(pmd_t *pmdp, pmd_t pmdval) { *pmdp = pmdval; lazy_hcall(LHCALL_SET_PMD, __pa(pmdp)&PAGE_MASK, (__pa(pmdp)&(PAGE_SIZE-1))/4, 0); } /* There are a couple of legacy places where the kernel sets a PTE, but we * don't know the top level any more. This is useless for us, since we don't * know which pagetable is changing or what address, so we just tell the Host * to forget all of them. Fortunately, this is very rare. * * ... except in early boot when the kernel sets up the initial pagetables, * which makes booting astonishingly slow. So we don't even tell the Host * anything changed until we've done the first page table switch. */ static void lguest_set_pte(pte_t *ptep, pte_t pteval) { *ptep = pteval; /* Don't bother with hypercall before initial setup. */ if (current_cr3) lazy_hcall(LHCALL_FLUSH_TLB, 1, 0, 0); } /* Unfortunately for Lguest, the pv_mmu_ops for page tables were based on * native page table operations. On native hardware you can set a new page * table entry whenever you want, but if you want to remove one you have to do * a TLB flush (a TLB is a little cache of page table entries kept by the CPU). * * So the lguest_set_pte_at() and lguest_set_pmd() functions above are only * called when a valid entry is written, not when it's removed (ie. marked not * present). Instead, this is where we come when the Guest wants to remove a * page table entry: we tell the Host to set that entry to 0 (ie. the present * bit is zero). */ static void lguest_flush_tlb_single(unsigned long addr) { /* Simply set it to zero: if it was not, it will fault back in. */ lazy_hcall(LHCALL_SET_PTE, current_cr3, addr, 0); } /* This is what happens after the Guest has removed a large number of entries. * This tells the Host that any of the page table entries for userspace might * have changed, ie. virtual addresses below PAGE_OFFSET. */ static void lguest_flush_tlb_user(void) { lazy_hcall(LHCALL_FLUSH_TLB, 0, 0, 0); } /* This is called when the kernel page tables have changed. That's not very * common (unless the Guest is using highmem, which makes the Guest extremely * slow), so it's worth separating this from the user flushing above. */ static void lguest_flush_tlb_kernel(void) { lazy_hcall(LHCALL_FLUSH_TLB, 1, 0, 0); } /* * The Unadvanced Programmable Interrupt Controller. * * This is an attempt to implement the simplest possible interrupt controller. * I spent some time looking though routines like set_irq_chip_and_handler, * set_irq_chip_and_handler_name, set_irq_chip_data and set_phasers_to_stun and * I *think* this is as simple as it gets. * * We can tell the Host what interrupts we want blocked ready for using the * lguest_data.interrupts bitmap, so disabling (aka "masking") them is as * simple as setting a bit. We don't actually "ack" interrupts as such, we * just mask and unmask them. I wonder if we should be cleverer? */ static void disable_lguest_irq(unsigned int irq) { set_bit(irq, lguest_data.blocked_interrupts); } static void enable_lguest_irq(unsigned int irq) { clear_bit(irq, lguest_data.blocked_interrupts); } /* This structure describes the lguest IRQ controller. */ static struct irq_chip lguest_irq_controller = { .name = "lguest", .mask = disable_lguest_irq, .mask_ack = disable_lguest_irq, .unmask = enable_lguest_irq, }; /* This sets up the Interrupt Descriptor Table (IDT) entry for each hardware * interrupt (except 128, which is used for system calls), and then tells the * Linux infrastructure that each interrupt is controlled by our level-based * lguest interrupt controller. */ static void __init lguest_init_IRQ(void) { unsigned int i; for (i = 0; i < LGUEST_IRQS; i++) { int vector = FIRST_EXTERNAL_VECTOR + i; if (vector != SYSCALL_VECTOR) { set_intr_gate(vector, interrupt[i]); set_irq_chip_and_handler(i, &lguest_irq_controller, handle_level_irq); } } /* This call is required to set up for 4k stacks, where we have * separate stacks for hard and soft interrupts. */ irq_ctx_init(smp_processor_id()); } /* * Time. * * It would be far better for everyone if the Guest had its own clock, but * until then the Host gives us the time on every interrupt. */ static unsigned long lguest_get_wallclock(void) { return lguest_data.time.tv_sec; } static cycle_t lguest_clock_read(void) { unsigned long sec, nsec; /* If the Host tells the TSC speed, we can trust that. */ if (lguest_data.tsc_khz) return native_read_tsc(); /* If we can't use the TSC, we read the time value written by the Host. * Since it's in two parts (seconds and nanoseconds), we risk reading * it just as it's changing from 99 & 0.999999999 to 100 and 0, and * getting 99 and 0. As Linux tends to come apart under the stress of * time travel, we must be careful: */ do { /* First we read the seconds part. */ sec = lguest_data.time.tv_sec; /* This read memory barrier tells the compiler and the CPU that * this can't be reordered: we have to complete the above * before going on. */ rmb(); /* Now we read the nanoseconds part. */ nsec = lguest_data.time.tv_nsec; /* Make sure we've done that. */ rmb(); /* Now if the seconds part has changed, try again. */ } while (unlikely(lguest_data.time.tv_sec != sec)); /* Our non-TSC clock is in real nanoseconds. */ return sec*1000000000ULL + nsec; } /* This is what we tell the kernel is our clocksource. */ static struct clocksource lguest_clock = { .name = "lguest", .rating = 400, .read = lguest_clock_read, .mask = CLOCKSOURCE_MASK(64), .mult = 1 << 22, .shift = 22, .flags = CLOCK_SOURCE_IS_CONTINUOUS, }; /* The "scheduler clock" is just our real clock, adjusted to start at zero */ static unsigned long long lguest_sched_clock(void) { return cyc2ns(&lguest_clock, lguest_clock_read() - clock_base); } /* We also need a "struct clock_event_device": Linux asks us to set it to go * off some time in the future. Actually, James Morris figured all this out, I * just applied the patch. */ static int lguest_clockevent_set_next_event(unsigned long delta, struct clock_event_device *evt) { if (delta < LG_CLOCK_MIN_DELTA) { if (printk_ratelimit()) printk(KERN_DEBUG "%s: small delta %lu ns\n", __FUNCTION__, delta); return -ETIME; } hcall(LHCALL_SET_CLOCKEVENT, delta, 0, 0); return 0; } static void lguest_clockevent_set_mode(enum clock_event_mode mode, struct clock_event_device *evt) { switch (mode) { case CLOCK_EVT_MODE_UNUSED: case CLOCK_EVT_MODE_SHUTDOWN: /* A 0 argument shuts the clock down. */ hcall(LHCALL_SET_CLOCKEVENT, 0, 0, 0); break; case CLOCK_EVT_MODE_ONESHOT: /* This is what we expect. */ break; case CLOCK_EVT_MODE_PERIODIC: BUG(); case CLOCK_EVT_MODE_RESUME: break; } } /* This describes our primitive timer chip. */ static struct clock_event_device lguest_clockevent = { .name = "lguest", .features = CLOCK_EVT_FEAT_ONESHOT, .set_next_event = lguest_clockevent_set_next_event, .set_mode = lguest_clockevent_set_mode, .rating = INT_MAX, .mult = 1, .shift = 0, .min_delta_ns = LG_CLOCK_MIN_DELTA, .max_delta_ns = LG_CLOCK_MAX_DELTA, }; /* This is the Guest timer interrupt handler (hardware interrupt 0). We just * call the clockevent infrastructure and it does whatever needs doing. */ static void lguest_time_irq(unsigned int irq, struct irq_desc *desc) { unsigned long flags; /* Don't interrupt us while this is running. */ local_irq_save(flags); lguest_clockevent.event_handler(&lguest_clockevent); local_irq_restore(flags); } /* At some point in the boot process, we get asked to set up our timing * infrastructure. The kernel doesn't expect timer interrupts before this, but * we cleverly initialized the "blocked_interrupts" field of "struct * lguest_data" so that timer interrupts were blocked until now. */ static void lguest_time_init(void) { /* Set up the timer interrupt (0) to go to our simple timer routine */ set_irq_handler(0, lguest_time_irq); /* Our clock structure look like arch/i386/kernel/tsc.c if we can use * the TSC, otherwise it's a dumb nanosecond-resolution clock. Either * way, the "rating" is initialized so high that it's always chosen * over any other clocksource. */ if (lguest_data.tsc_khz) lguest_clock.mult = clocksource_khz2mult(lguest_data.tsc_khz, lguest_clock.shift); clock_base = lguest_clock_read(); clocksource_register(&lguest_clock); /* Now we've set up our clock, we can use it as the scheduler clock */ pv_time_ops.sched_clock = lguest_sched_clock; /* We can't set cpumask in the initializer: damn C limitations! Set it * here and register our timer device. */ lguest_clockevent.cpumask = cpumask_of_cpu(0); clockevents_register_device(&lguest_clockevent); /* Finally, we unblock the timer interrupt. */ enable_lguest_irq(0); } /* * Miscellaneous bits and pieces. * * Here is an oddball collection of functions which the Guest needs for things * to work. They're pretty simple. */ /* The Guest needs to tell the host what stack it expects traps to use. For * native hardware, this is part of the Task State Segment mentioned above in * lguest_load_tr_desc(), but to help hypervisors there's this special call. * * We tell the Host the segment we want to use (__KERNEL_DS is the kernel data * segment), the privilege level (we're privilege level 1, the Host is 0 and * will not tolerate us trying to use that), the stack pointer, and the number * of pages in the stack. */ static void lguest_load_esp0(struct tss_struct *tss, struct thread_struct *thread) { lazy_hcall(LHCALL_SET_STACK, __KERNEL_DS|0x1, thread->esp0, THREAD_SIZE/PAGE_SIZE); } /* Let's just say, I wouldn't do debugging under a Guest. */ static void lguest_set_debugreg(int regno, unsigned long value) { /* FIXME: Implement */ } /* There are times when the kernel wants to make sure that no memory writes are * caught in the cache (that they've all reached real hardware devices). This * doesn't matter for the Guest which has virtual hardware. * * On the Pentium 4 and above, cpuid() indicates that the Cache Line Flush * (clflush) instruction is available and the kernel uses that. Otherwise, it * uses the older "Write Back and Invalidate Cache" (wbinvd) instruction. * Unlike clflush, wbinvd can only be run at privilege level 0. So we can * ignore clflush, but replace wbinvd. */ static void lguest_wbinvd(void) { } /* If the Guest expects to have an Advanced Programmable Interrupt Controller, * we play dumb by ignoring writes and returning 0 for reads. So it's no * longer Programmable nor Controlling anything, and I don't think 8 lines of * code qualifies for Advanced. It will also never interrupt anything. It * does, however, allow us to get through the Linux boot code. */ #ifdef CONFIG_X86_LOCAL_APIC static void lguest_apic_write(unsigned long reg, unsigned long v) { } static unsigned long lguest_apic_read(unsigned long reg) { return 0; } #endif /* STOP! Until an interrupt comes in. */ static void lguest_safe_halt(void) { hcall(LHCALL_HALT, 0, 0, 0); } /* Perhaps CRASH isn't the best name for this hypercall, but we use it to get a * message out when we're crashing as well as elegant termination like powering * off. * * Note that the Host always prefers that the Guest speak in physical addresses * rather than virtual addresses, so we use __pa() here. */ static void lguest_power_off(void) { hcall(LHCALL_CRASH, __pa("Power down"), 0, 0); } /* * Panicing. * * Don't. But if you did, this is what happens. */ static int lguest_panic(struct notifier_block *nb, unsigned long l, void *p) { hcall(LHCALL_CRASH, __pa(p), 0, 0); /* The hcall won't return, but to keep gcc happy, we're "done". */ return NOTIFY_DONE; } static struct notifier_block paniced = { .notifier_call = lguest_panic }; /* Setting up memory is fairly easy. */ static __init char *lguest_memory_setup(void) { /* We do this here and not earlier because lockcheck barfs if we do it * before start_kernel() */ atomic_notifier_chain_register(&panic_notifier_list, &paniced); /* The Linux bootloader header contains an "e820" memory map: the * Launcher populated the first entry with our memory limit. */ add_memory_region(boot_params.e820_map[0].addr, boot_params.e820_map[0].size, boot_params.e820_map[0].type); /* This string is for the boot messages. */ return "LGUEST"; } /*G:050 * Patching (Powerfully Placating Performance Pedants) * * We have already seen that pv_ops structures let us replace simple * native instructions with calls to the appropriate back end all throughout * the kernel. This allows the same kernel to run as a Guest and as a native * kernel, but it's slow because of all the indirect branches. * * Remember that David Wheeler quote about "Any problem in computer science can * be solved with another layer of indirection"? The rest of that quote is * "... But that usually will create another problem." This is the first of * those problems. * * Our current solution is to allow the paravirt back end to optionally patch * over the indirect calls to replace them with something more efficient. We * patch the four most commonly called functions: disable interrupts, enable * interrupts, restore interrupts and save interrupts. We usually have 10 * bytes to patch into: the Guest versions of these operations are small enough * that we can fit comfortably. * * First we need assembly templates of each of the patchable Guest operations, * and these are in lguest_asm.S. */ /*G:060 We construct a table from the assembler templates: */ static const struct lguest_insns { const char *start, *end; } lguest_insns[] = { [PARAVIRT_PATCH(pv_irq_ops.irq_disable)] = { lgstart_cli, lgend_cli }, [PARAVIRT_PATCH(pv_irq_ops.irq_enable)] = { lgstart_sti, lgend_sti }, [PARAVIRT_PATCH(pv_irq_ops.restore_fl)] = { lgstart_popf, lgend_popf }, [PARAVIRT_PATCH(pv_irq_ops.save_fl)] = { lgstart_pushf, lgend_pushf }, }; /* Now our patch routine is fairly simple (based on the native one in * paravirt.c). If we have a replacement, we copy it in and return how much of * the available space we used. */ static unsigned lguest_patch(u8 type, u16 clobber, void *ibuf, unsigned long addr, unsigned len) { unsigned int insn_len; /* Don't do anything special if we don't have a replacement */ if (type >= ARRAY_SIZE(lguest_insns) || !lguest_insns[type].start) return paravirt_patch_default(type, clobber, ibuf, addr, len); insn_len = lguest_insns[type].end - lguest_insns[type].start; /* Similarly if we can't fit replacement (shouldn't happen, but let's * be thorough). */ if (len < insn_len) return paravirt_patch_default(type, clobber, ibuf, addr, len); /* Copy in our instructions. */ memcpy(ibuf, lguest_insns[type].start, insn_len); return insn_len; } /*G:030 Once we get to lguest_init(), we know we're a Guest. The pv_ops * structures in the kernel provide points for (almost) every routine we have * to override to avoid privileged instructions. */ __init void lguest_init(void *boot) { /* Copy boot parameters first: the Launcher put the physical location * in %esi, and head.S converted that to a virtual address and handed * it to us. We use "__memcpy" because "memcpy" sometimes tries to do * tricky things to go faster, and we're not ready for that. */ __memcpy(&boot_params, boot, PARAM_SIZE); /* The boot parameters also tell us where the command-line is: save * that, too. */ __memcpy(boot_command_line, __va(boot_params.hdr.cmd_line_ptr), COMMAND_LINE_SIZE); /* We're under lguest, paravirt is enabled, and we're running at * privilege level 1, not 0 as normal. */ pv_info.name = "lguest"; pv_info.paravirt_enabled = 1; pv_info.kernel_rpl = 1; /* We set up all the lguest overrides for sensitive operations. These * are detailed with the operations themselves. */ /* interrupt-related operations */ pv_irq_ops.init_IRQ = lguest_init_IRQ; pv_irq_ops.save_fl = save_fl; pv_irq_ops.restore_fl = restore_fl; pv_irq_ops.irq_disable = irq_disable; pv_irq_ops.irq_enable = irq_enable; pv_irq_ops.safe_halt = lguest_safe_halt; /* init-time operations */ pv_init_ops.memory_setup = lguest_memory_setup; pv_init_ops.patch = lguest_patch; /* Intercepts of various cpu instructions */ pv_cpu_ops.load_gdt = lguest_load_gdt; pv_cpu_ops.cpuid = lguest_cpuid; pv_cpu_ops.load_idt = lguest_load_idt; pv_cpu_ops.iret = lguest_iret; pv_cpu_ops.load_esp0 = lguest_load_esp0; pv_cpu_ops.load_tr_desc = lguest_load_tr_desc; pv_cpu_ops.set_ldt = lguest_set_ldt; pv_cpu_ops.load_tls = lguest_load_tls; pv_cpu_ops.set_debugreg = lguest_set_debugreg; pv_cpu_ops.clts = lguest_clts; pv_cpu_ops.read_cr0 = lguest_read_cr0; pv_cpu_ops.write_cr0 = lguest_write_cr0; pv_cpu_ops.read_cr4 = lguest_read_cr4; pv_cpu_ops.write_cr4 = lguest_write_cr4; pv_cpu_ops.write_gdt_entry = lguest_write_gdt_entry; pv_cpu_ops.write_idt_entry = lguest_write_idt_entry; pv_cpu_ops.wbinvd = lguest_wbinvd; pv_cpu_ops.lazy_mode.enter = paravirt_enter_lazy_cpu; pv_cpu_ops.lazy_mode.leave = lguest_leave_lazy_mode; /* pagetable management */ pv_mmu_ops.write_cr3 = lguest_write_cr3; pv_mmu_ops.flush_tlb_user = lguest_flush_tlb_user; pv_mmu_ops.flush_tlb_single = lguest_flush_tlb_single; pv_mmu_ops.flush_tlb_kernel = lguest_flush_tlb_kernel; pv_mmu_ops.set_pte = lguest_set_pte; pv_mmu_ops.set_pte_at = lguest_set_pte_at; pv_mmu_ops.set_pmd = lguest_set_pmd; pv_mmu_ops.read_cr2 = lguest_read_cr2; pv_mmu_ops.read_cr3 = lguest_read_cr3; pv_mmu_ops.lazy_mode.enter = paravirt_enter_lazy_mmu; pv_mmu_ops.lazy_mode.leave = lguest_leave_lazy_mode; #ifdef CONFIG_X86_LOCAL_APIC /* apic read/write intercepts */ pv_apic_ops.apic_write = lguest_apic_write; pv_apic_ops.apic_write_atomic = lguest_apic_write; pv_apic_ops.apic_read = lguest_apic_read; #endif /* time operations */ pv_time_ops.get_wallclock = lguest_get_wallclock; pv_time_ops.time_init = lguest_time_init; /* Now is a good time to look at the implementations of these functions * before returning to the rest of lguest_init(). */ /*G:070 Now we've seen all the paravirt_ops, we return to * lguest_init() where the rest of the fairly chaotic boot setup * occurs. * * The Host expects our first hypercall to tell it where our "struct * lguest_data" is, so we do that first. */ hcall(LHCALL_LGUEST_INIT, __pa(&lguest_data), 0, 0); /* The native boot code sets up initial page tables immediately after * the kernel itself, and sets init_pg_tables_end so they're not * clobbered. The Launcher places our initial pagetables somewhere at * the top of our physical memory, so we don't need extra space: set * init_pg_tables_end to the end of the kernel. */ init_pg_tables_end = __pa(pg0); /* Load the %fs segment register (the per-cpu segment register) with * the normal data segment to get through booting. */ asm volatile ("mov %0, %%fs" : : "r" (__KERNEL_DS) : "memory"); /* Clear the part of the kernel data which is expected to be zero. * Normally it will be anyway, but if we're loading from a bzImage with * CONFIG_RELOCATALE=y, the relocations will be sitting here. */ memset(__bss_start, 0, __bss_stop - __bss_start); /* The Host uses the top of the Guest's virtual address space for the * Host<->Guest Switcher, and it tells us how much it needs in * lguest_data.reserve_mem, set up on the LGUEST_INIT hypercall. */ reserve_top_address(lguest_data.reserve_mem); /* If we don't initialize the lock dependency checker now, it crashes * paravirt_disable_iospace. */ lockdep_init(); /* The IDE code spends about 3 seconds probing for disks: if we reserve * all the I/O ports up front it can't get them and so doesn't probe. * Other device drivers are similar (but less severe). This cuts the * kernel boot time on my machine from 4.1 seconds to 0.45 seconds. */ paravirt_disable_iospace(); /* This is messy CPU setup stuff which the native boot code does before * start_kernel, so we have to do, too: */ cpu_detect(&new_cpu_data); /* head.S usually sets up the first capability word, so do it here. */ new_cpu_data.x86_capability[0] = cpuid_edx(1); /* Math is always hard! */ new_cpu_data.hard_math = 1; #ifdef CONFIG_X86_MCE mce_disabled = 1; #endif #ifdef CONFIG_ACPI acpi_disabled = 1; acpi_ht = 0; #endif /* We set the perferred console to "hvc". This is the "hypervisor * virtual console" driver written by the PowerPC people, which we also * adapted for lguest's use. */ add_preferred_console("hvc", 0, NULL); /* Last of all, we set the power management poweroff hook to point to * the Guest routine to power off. */ pm_power_off = lguest_power_off; /* Now we're set up, call start_kernel() in init/main.c and we proceed * to boot as normal. It never returns. */ start_kernel(); } /* * This marks the end of stage II of our journey, The Guest. * * It is now time for us to explore the nooks and crannies of the three Guest * devices and complete our understanding of the Guest in "make Drivers". */