Cache and TLB Flushing
  		     Under Linux
  
  	    David S. Miller <davem@redhat.com>
  
  This document describes the cache/tlb flushing interfaces called
  by the Linux VM subsystem.  It enumerates over each interface,
  describes its intended purpose, and what side effect is expected
  after the interface is invoked.
  
  The side effects described below are stated for a uniprocessor
  implementation, and what is to happen on that single processor.  The
  SMP cases are a simple extension, in that you just extend the
  definition such that the side effect for a particular interface occurs
  on all processors in the system.  Don't let this scare you into
  thinking SMP cache/tlb flushing must be so inefficient, this is in
  fact an area where many optimizations are possible.  For example,
  if it can be proven that a user address space has never executed
  on a cpu (see mm_cpumask()), one need not perform a flush
  for this address space on that cpu.
  
  First, the TLB flushing interfaces, since they are the simplest.  The
  "TLB" is abstracted under Linux as something the cpu uses to cache
  virtual-->physical address translations obtained from the software
  page tables.  Meaning that if the software page tables change, it is
  possible for stale translations to exist in this "TLB" cache.
  Therefore when software page table changes occur, the kernel will
  invoke one of the following flush methods _after_ the page table
  changes occur:
  
  1) void flush_tlb_all(void)
  
  	The most severe flush of all.  After this interface runs,
  	any previous page table modification whatsoever will be
  	visible to the cpu.
  
  	This is usually invoked when the kernel page tables are
  	changed, since such translations are "global" in nature.
  
  2) void flush_tlb_mm(struct mm_struct *mm)
  
  	This interface flushes an entire user address space from
  	the TLB.  After running, this interface must make sure that
  	any previous page table modifications for the address space
  	'mm' will be visible to the cpu.  That is, after running,
  	there will be no entries in the TLB for 'mm'.
  
  	This interface is used to handle whole address space
  	page table operations such as what happens during
  	fork, and exec.
  
  3) void flush_tlb_range(struct vm_area_struct *vma,
  			unsigned long start, unsigned long end)
  
  	Here we are flushing a specific range of (user) virtual
  	address translations from the TLB.  After running, this
  	interface must make sure that any previous page table
  	modifications for the address space 'vma->vm_mm' in the range
  	'start' to 'end-1' will be visible to the cpu.  That is, after
  	running, there will be no entries in the TLB for 'mm' for
  	virtual addresses in the range 'start' to 'end-1'.
  
  	The "vma" is the backing store being used for the region.
  	Primarily, this is used for munmap() type operations.
  
  	The interface is provided in hopes that the port can find
  	a suitably efficient method for removing multiple page
  	sized translations from the TLB, instead of having the kernel
  	call flush_tlb_page (see below) for each entry which may be
  	modified.
  
  4) void flush_tlb_page(struct vm_area_struct *vma, unsigned long addr)
  
  	This time we need to remove the PAGE_SIZE sized translation
  	from the TLB.  The 'vma' is the backing structure used by
  	Linux to keep track of mmap'd regions for a process, the
  	address space is available via vma->vm_mm.  Also, one may
  	test (vma->vm_flags & VM_EXEC) to see if this region is
  	executable (and thus could be in the 'instruction TLB' in
  	split-tlb type setups).
  
  	After running, this interface must make sure that any previous
  	page table modification for address space 'vma->vm_mm' for
  	user virtual address 'addr' will be visible to the cpu.  That
  	is, after running, there will be no entries in the TLB for
  	'vma->vm_mm' for virtual address 'addr'.
  
  	This is used primarily during fault processing.
  
  5) void update_mmu_cache(struct vm_area_struct *vma,
  			 unsigned long address, pte_t *ptep)
  
  	At the end of every page fault, this routine is invoked to
  	tell the architecture specific code that a translation
  	now exists at virtual address "address" for address space
  	"vma->vm_mm", in the software page tables.
  
  	A port may use this information in any way it so chooses.
  	For example, it could use this event to pre-load TLB
  	translations for software managed TLB configurations.
  	The sparc64 port currently does this.
  
  6) void tlb_migrate_finish(struct mm_struct *mm)
  
  	This interface is called at the end of an explicit
  	process migration. This interface provides a hook
  	to allow a platform to update TLB or context-specific
  	information for the address space.
  
  	The ia64 sn2 platform is one example of a platform
  	that uses this interface.
  
  Next, we have the cache flushing interfaces.  In general, when Linux
  is changing an existing virtual-->physical mapping to a new value,
  the sequence will be in one of the following forms:
  
  	1) flush_cache_mm(mm);
  	   change_all_page_tables_of(mm);
  	   flush_tlb_mm(mm);
  
  	2) flush_cache_range(vma, start, end);
  	   change_range_of_page_tables(mm, start, end);
  	   flush_tlb_range(vma, start, end);
  
  	3) flush_cache_page(vma, addr, pfn);
  	   set_pte(pte_pointer, new_pte_val);
  	   flush_tlb_page(vma, addr);
  
  The cache level flush will always be first, because this allows
  us to properly handle systems whose caches are strict and require
  a virtual-->physical translation to exist for a virtual address
  when that virtual address is flushed from the cache.  The HyperSparc
  cpu is one such cpu with this attribute.
  
  The cache flushing routines below need only deal with cache flushing
  to the extent that it is necessary for a particular cpu.  Mostly,
  these routines must be implemented for cpus which have virtually
  indexed caches which must be flushed when virtual-->physical
  translations are changed or removed.  So, for example, the physically
  indexed physically tagged caches of IA32 processors have no need to
  implement these interfaces since the caches are fully synchronized
  and have no dependency on translation information.
  
  Here are the routines, one by one:
  
  1) void flush_cache_mm(struct mm_struct *mm)
  
  	This interface flushes an entire user address space from
  	the caches.  That is, after running, there will be no cache
  	lines associated with 'mm'.
  
  	This interface is used to handle whole address space
  	page table operations such as what happens during exit and exec.
  
  2) void flush_cache_dup_mm(struct mm_struct *mm)
  
  	This interface flushes an entire user address space from
  	the caches.  That is, after running, there will be no cache
  	lines associated with 'mm'.
  
  	This interface is used to handle whole address space
  	page table operations such as what happens during fork.
  
  	This option is separate from flush_cache_mm to allow some
  	optimizations for VIPT caches.
  
  3) void flush_cache_range(struct vm_area_struct *vma,
  			  unsigned long start, unsigned long end)
  
  	Here we are flushing a specific range of (user) virtual
  	addresses from the cache.  After running, there will be no
  	entries in the cache for 'vma->vm_mm' for virtual addresses in
  	the range 'start' to 'end-1'.
  
  	The "vma" is the backing store being used for the region.
  	Primarily, this is used for munmap() type operations.
  
  	The interface is provided in hopes that the port can find
  	a suitably efficient method for removing multiple page
  	sized regions from the cache, instead of having the kernel
  	call flush_cache_page (see below) for each entry which may be
  	modified.
  
  4) void flush_cache_page(struct vm_area_struct *vma, unsigned long addr, unsigned long pfn)
  
  	This time we need to remove a PAGE_SIZE sized range
  	from the cache.  The 'vma' is the backing structure used by
  	Linux to keep track of mmap'd regions for a process, the
  	address space is available via vma->vm_mm.  Also, one may
  	test (vma->vm_flags & VM_EXEC) to see if this region is
  	executable (and thus could be in the 'instruction cache' in
  	"Harvard" type cache layouts).
  
  	The 'pfn' indicates the physical page frame (shift this value
  	left by PAGE_SHIFT to get the physical address) that 'addr'
  	translates to.  It is this mapping which should be removed from
  	the cache.
  
  	After running, there will be no entries in the cache for
  	'vma->vm_mm' for virtual address 'addr' which translates
  	to 'pfn'.
  
  	This is used primarily during fault processing.
  
  5) void flush_cache_kmaps(void)
  
  	This routine need only be implemented if the platform utilizes
  	highmem.  It will be called right before all of the kmaps
  	are invalidated.
  
  	After running, there will be no entries in the cache for
  	the kernel virtual address range PKMAP_ADDR(0) to
  	PKMAP_ADDR(LAST_PKMAP).
  
  	This routing should be implemented in asm/highmem.h
  
  6) void flush_cache_vmap(unsigned long start, unsigned long end)
     void flush_cache_vunmap(unsigned long start, unsigned long end)
  
  	Here in these two interfaces we are flushing a specific range
  	of (kernel) virtual addresses from the cache.  After running,
  	there will be no entries in the cache for the kernel address
  	space for virtual addresses in the range 'start' to 'end-1'.
  
  	The first of these two routines is invoked after map_vm_area()
  	has installed the page table entries.  The second is invoked
  	before unmap_kernel_range() deletes the page table entries.
  
  There exists another whole class of cpu cache issues which currently
  require a whole different set of interfaces to handle properly.
  The biggest problem is that of virtual aliasing in the data cache
  of a processor.
  
  Is your port susceptible to virtual aliasing in its D-cache?
  Well, if your D-cache is virtually indexed, is larger in size than
  PAGE_SIZE, and does not prevent multiple cache lines for the same
  physical address from existing at once, you have this problem.
  
  If your D-cache has this problem, first define asm/shmparam.h SHMLBA
  properly, it should essentially be the size of your virtually
  addressed D-cache (or if the size is variable, the largest possible
  size).  This setting will force the SYSv IPC layer to only allow user
  processes to mmap shared memory at address which are a multiple of
  this value.
  
  NOTE: This does not fix shared mmaps, check out the sparc64 port for
  one way to solve this (in particular SPARC_FLAG_MMAPSHARED).
  
  Next, you have to solve the D-cache aliasing issue for all
  other cases.  Please keep in mind that fact that, for a given page
  mapped into some user address space, there is always at least one more
  mapping, that of the kernel in its linear mapping starting at
  PAGE_OFFSET.  So immediately, once the first user maps a given
  physical page into its address space, by implication the D-cache
  aliasing problem has the potential to exist since the kernel already
  maps this page at its virtual address.
  
    void copy_user_page(void *to, void *from, unsigned long addr, struct page *page)
    void clear_user_page(void *to, unsigned long addr, struct page *page)
  
  	These two routines store data in user anonymous or COW
  	pages.  It allows a port to efficiently avoid D-cache alias
  	issues between userspace and the kernel.
  
  	For example, a port may temporarily map 'from' and 'to' to
  	kernel virtual addresses during the copy.  The virtual address
  	for these two pages is chosen in such a way that the kernel
  	load/store instructions happen to virtual addresses which are
  	of the same "color" as the user mapping of the page.  Sparc64
  	for example, uses this technique.
  
  	The 'addr' parameter tells the virtual address where the
  	user will ultimately have this page mapped, and the 'page'
  	parameter gives a pointer to the struct page of the target.
  
  	If D-cache aliasing is not an issue, these two routines may
  	simply call memcpy/memset directly and do nothing more.
  
    void flush_dcache_page(struct page *page)
  
  	Any time the kernel writes to a page cache page, _OR_
  	the kernel is about to read from a page cache page and
  	user space shared/writable mappings of this page potentially
  	exist, this routine is called.
  
  	NOTE: This routine need only be called for page cache pages
  	      which can potentially ever be mapped into the address
  	      space of a user process.  So for example, VFS layer code
  	      handling vfs symlinks in the page cache need not call
  	      this interface at all.
  
  	The phrase "kernel writes to a page cache page" means,
  	specifically, that the kernel executes store instructions
  	that dirty data in that page at the page->virtual mapping
  	of that page.  It is important to flush here to handle
  	D-cache aliasing, to make sure these kernel stores are
  	visible to user space mappings of that page.
  
  	The corollary case is just as important, if there are users
  	which have shared+writable mappings of this file, we must make
  	sure that kernel reads of these pages will see the most recent
  	stores done by the user.
  
  	If D-cache aliasing is not an issue, this routine may
  	simply be defined as a nop on that architecture.
  
          There is a bit set aside in page->flags (PG_arch_1) as
  	"architecture private".  The kernel guarantees that,
  	for pagecache pages, it will clear this bit when such
  	a page first enters the pagecache.
  
  	This allows these interfaces to be implemented much more
  	efficiently.  It allows one to "defer" (perhaps indefinitely)
  	the actual flush if there are currently no user processes
  	mapping this page.  See sparc64's flush_dcache_page and
  	update_mmu_cache implementations for an example of how to go
  	about doing this.
  
  	The idea is, first at flush_dcache_page() time, if
  	page->mapping->i_mmap is an empty tree and ->i_mmap_nonlinear
  	an empty list, just mark the architecture private page flag bit.
  	Later, in update_mmu_cache(), a check is made of this flag bit,
  	and if set the flush is done and the flag bit is cleared.
  
  	IMPORTANT NOTE: It is often important, if you defer the flush,
  			that the actual flush occurs on the same CPU
  			as did the cpu stores into the page to make it
  			dirty.  Again, see sparc64 for examples of how
  			to deal with this.
  
    void copy_to_user_page(struct vm_area_struct *vma, struct page *page,
                           unsigned long user_vaddr,
                           void *dst, void *src, int len)
    void copy_from_user_page(struct vm_area_struct *vma, struct page *page,
                             unsigned long user_vaddr,
                             void *dst, void *src, int len)
  	When the kernel needs to copy arbitrary data in and out
  	of arbitrary user pages (f.e. for ptrace()) it will use
  	these two routines.
  
  	Any necessary cache flushing or other coherency operations
  	that need to occur should happen here.  If the processor's
  	instruction cache does not snoop cpu stores, it is very
  	likely that you will need to flush the instruction cache
  	for copy_to_user_page().
  
    void flush_anon_page(struct vm_area_struct *vma, struct page *page,
                         unsigned long vmaddr)
    	When the kernel needs to access the contents of an anonymous
  	page, it calls this function (currently only
  	get_user_pages()).  Note: flush_dcache_page() deliberately
  	doesn't work for an anonymous page.  The default
  	implementation is a nop (and should remain so for all coherent
  	architectures).  For incoherent architectures, it should flush
  	the cache of the page at vmaddr.
  
    void flush_kernel_dcache_page(struct page *page)
  	When the kernel needs to modify a user page is has obtained
  	with kmap, it calls this function after all modifications are
  	complete (but before kunmapping it) to bring the underlying
  	page up to date.  It is assumed here that the user has no
  	incoherent cached copies (i.e. the original page was obtained
  	from a mechanism like get_user_pages()).  The default
  	implementation is a nop and should remain so on all coherent
  	architectures.  On incoherent architectures, this should flush
  	the kernel cache for page (using page_address(page)).
  
  
    void flush_icache_range(unsigned long start, unsigned long end)
    	When the kernel stores into addresses that it will execute
  	out of (eg when loading modules), this function is called.
  
  	If the icache does not snoop stores then this routine will need
  	to flush it.
  
    void flush_icache_page(struct vm_area_struct *vma, struct page *page)
  	All the functionality of flush_icache_page can be implemented in
  	flush_dcache_page and update_mmu_cache. In the future, the hope
  	is to remove this interface completely.
  
  The final category of APIs is for I/O to deliberately aliased address
  ranges inside the kernel.  Such aliases are set up by use of the
  vmap/vmalloc API.  Since kernel I/O goes via physical pages, the I/O
  subsystem assumes that the user mapping and kernel offset mapping are
  the only aliases.  This isn't true for vmap aliases, so anything in
  the kernel trying to do I/O to vmap areas must manually manage
  coherency.  It must do this by flushing the vmap range before doing
  I/O and invalidating it after the I/O returns.
  
    void flush_kernel_vmap_range(void *vaddr, int size)
         flushes the kernel cache for a given virtual address range in
         the vmap area.  This is to make sure that any data the kernel
         modified in the vmap range is made visible to the physical
         page.  The design is to make this area safe to perform I/O on.
         Note that this API does *not* also flush the offset map alias
         of the area.
  
    void invalidate_kernel_vmap_range(void *vaddr, int size) invalidates
         the cache for a given virtual address range in the vmap area
         which prevents the processor from making the cache stale by
         speculatively reading data while the I/O was occurring to the
         physical pages.  This is only necessary for data reads into the
         vmap area.