- 07 Dec, 2006 40 commits
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Nigel Cunningham authored
Minor whitespace and formatting modifications for the freezer. Signed-off-by:
Nigel Cunningham <nigel@suspend2.net> Acked-by:
Pavel Machek <pavel@ucw.cz> Cc: "Rafael J. Wysocki" <rjw@sisk.pl> Signed-off-by:
Andrew Morton <akpm@osdl.org> Signed-off-by:
Linus Torvalds <torvalds@osdl.org>
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Nigel Cunningham authored
The freezer currently prints an '=' for every process that is frozen. This is pretty pointless, as the equals sign says nothing about which process is frozen, and makes logs look messier (especially if there were a large number of processes running). All we really need to know is that we started trying to freeze processes and what processes (if any) failed to freeze, or that we succeeded. Signed-off-by:
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Nigel Cunningham authored
Move process freezing functions from include/linux/sched.h to freezer.h, so that modifications to the freezer or the kernel configuration don't require recompiling just about everything. [akpm@osdl.org: fix ueagle driver] Signed-off-by:
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Stefan Seyfried authored
At some point after 2.6.13, in-kernel software suspend got "incomplete" for the so-called "platform" mode. pm_ops->prepare() is never called. A visible sign of this is the "moon" light on thinkpads not flashing during suspend. Fix by readding the pm_ops->prepare call during suspend. Signed-off-by:
Stefan Seyfried <seife@suse.de> Acked-by:
"Rafael J. Wysocki" <rjw@sisk.pl> Signed-off-by:
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Rafael J. Wysocki authored
swsusp uses GFP_ATOMIC, but it can afford to use __GFP_WAIT, which will permit it to reclaim clean pagecache instead of emitting scary page-allocation-failure messages. Cc: Pavel Machek <pavel@ucw.cz> Signed-off-by:
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Rafael J. Wysocki authored
Currently swsusp saves the contents of highmem pages by copying them to the normal zone which is quite inefficient (eg. it requires two normal pages to be used for saving one highmem page). This may be improved by using highmem for saving the contents of saveable highmem pages. Namely, during the suspend phase of the suspend-resume cycle we try to allocate as many free highmem pages as there are saveable highmem pages. If there are not enough highmem image pages to store the contents of all of the saveable highmem pages, some of them will be stored in the "normal" memory. Next, we allocate as many free "normal" pages as needed to store the (remaining) image data. We use a memory bitmap to mark the allocated free pages (ie. highmem as well as "normal" image pages). Now, we use another memory bitmap to mark all of the saveable pages (highmem as well as "normal") and the contents of the saveable pages are copied into the image pages. Then, the second bitmap is used to save the pfns corresponding to the saveable pages and the first one is used to save their data. During the resume phase the pfns of the pages that were saveable during the suspend are loaded from the image and used to mark the "unsafe" page frames. Next, we try to allocate as many free highmem page frames as to load all of the image data that had been in the highmem before the suspend and we allocate so many free "normal" page frames that the total number of allocated free pages (highmem and "normal") is equal to the size of the image. While doing this we have to make sure that there will be some extra free "normal" and "safe" page frames for two lists of PBEs constructed later. Now, the image data are loaded, if possible, into their "original" page frames. The image data that cannot be written into their "original" page frames are loaded into "safe" page frames and their "original" kernel virtual addresses, as well as the addresses of the "safe" pages containing their copies, are stored in one of two lists of PBEs. One list of PBEs is for the copies of "normal" suspend pages (ie. "normal" pages that were saveable during the suspend) and it is used in the same way as previously (ie. by the architecture-dependent parts of swsusp). The other list of PBEs is for the copies of highmem suspend pages. The pages in this list are restored (in a reversible way) right before the arch-dependent code is called. Signed-off-by:
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Rafael J. Wysocki authored
The swsusp userland interface has recently changed for a couple of times, but the changes have not been documented. Fix this, and document the SNAPSHOT_SET_SWAP_AREA ioctl(). Signed-off-by:
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Rafael J. Wysocki authored
To be able to use swap files as suspend storage from the userland suspend tools we need an additional ioctl() that will allow us to provide the kernel with both the swap header's offset and the identification of the resume partition. The new ioctl() should be regarded as a replacement for the SNAPSHOT_SET_SWAP_FILE ioctl() that from now on will be considered as obsolete, but has to stay for backwards compatibility of the interface. Signed-off-by:
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Rafael J. Wysocki authored
Document the "resume_offset=" command line parameter as well as the way in which swap files are supported by swsusp. Signed-off-by:
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Rafael J. Wysocki authored
Add the kernel command line parameter "resume_offset=" allowing us to specify the offset, in <PAGE_SIZE> units, from the beginning of the partition pointed to by the "resume=" parameter at which the swap header is located. This offset can be determined, for example, by an application using the FIBMAP ioctl to obtain the swap header's block number for given file. [akpm@osdl.org: we don't know what type sector_t is] Signed-off-by:
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Rafael J. Wysocki authored
Make swsusp use block device offsets instead of swap offsets to identify swap locations and make it use the same code paths for writing as well as for reading data. This allows us to use the same code for handling swap files and swap partitions and to simplify the code, eg. by dropping rw_swap_page_sync(). Signed-off-by:
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Rafael J. Wysocki authored
Rearrange the code in kernel/power/swap.c so that the next patch is more readable. [This patch only moves the existing code.] Signed-off-by:
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Rafael J. Wysocki authored
The Linux kernel handles swap files almost in the same way as it handles swap partitions and there are only two differences between these two types of swap areas: (1) swap files need not be contiguous, (2) the header of a swap file is not in the first block of the partition that holds it. From the swsusp's point of view (1) is not a problem, because it is already taken care of by the swap-handling code, but (2) has to be taken into consideration. In principle the location of a swap file's header may be determined with the help of appropriate filesystem driver. Unfortunately, however, it requires the filesystem holding the swap file to be mounted, and if this filesystem is journaled, it cannot be mounted during a resume from disk. For this reason we need some other means by which swap areas can be identified. For example, to identify a swap area we can use the partition that holds the area and the offset from the beginning of this partition at which the swap header is located. The following patch allows swsusp to identify swap areas this way. It changes swap_type_of() so that it takes an additional argument representing an offset of the swap header within the partition represented by its first argument. Signed-off-by: -
Stefan Seyfried authored
Add an ioctl to the userspace swsusp code that enables the usage of the pmops->prepare, pmops->enter and pmops->finish methods (the in-kernel suspend knows these as "platform method"). These are needed on many machines to (among others) speed up resuming by letting the BIOS skip some steps or let my hp nx5000 recognise the correct ac_adapter state after resume again. It also ensures on many machines, that changed hardware (unplugged AC adapters) gets correctly detected and that kacpid does not run wild after resume. Signed-off-by:
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Alan Cox authored
Now that we have pci_get_bus_and_slot we can do the job correctly. Note that some of these calls intentionally leak a device - this is because the device in question is always needed from boot to reboot. Signed-off-by:
Alan Cox <alan@redhat.com> Cc: Richard Henderson <rth@twiddle.net> Cc: Ivan Kokshaysky <ink@jurassic.park.msu.ru> Signed-off-by:
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Mariusz Kozlowski authored
Signed-off-by:
Mariusz Kozlowski <m.kozlowski@tuxland.pl> Cc: Yoshinori Sato <ysato@users.sourceforge.jp> Signed-off-by:
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Paul Mundt authored
While working on SH kprobes, I noticed that avr32 got the preemption handling wrong in the no probe case. The idea is that upon entry of kprobe_handler() preemption is disabled outright across the life of the kprobe, only to be re-enabled in post_kprobe_handler(). However, in the event that the probe is never activated, there's never any chance of hitting the post probe handler, which allows for the current avr32 implementation to disable preemption indefinitely, as it's currently missing a re-enable when no probe is activated. Signed-off-by:
Paul Mundt <lethal@linux-sh.org> Cc: Haavard Skinnemoen <hskinnemoen@atmel.com> Signed-off-by:
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Adrian Bunk authored
This patch fixes the following compile error with -Werror-implicit-function-declaration (without -Werror-implicit-function-declaration it's a link error): ... CC arch/frv/kernel/futex.o /home/bunk/linux/kernel-2.6/linux-2.6.19-rc6-mm2/arch/frv/kernel/futex.c: In function 'futex_atomic_op_inuser': /home/bunk/linux/kernel-2.6/linux-2.6.19-rc6-mm2/arch/frv/kernel/futex.c:203: error: implicit declaration of function 'pagefault_disable' /home/bunk/linux/kernel-2.6/linux-2.6.19-rc6-mm2/arch/frv/kernel/futex.c:226: error: implicit declaration of function 'pagefault_enable' make[2]: *** [arch/frv/kernel/futex.o] Error 1 ... Signed-off-by:Adrian Bunk <bunk@stusta.de> Acked-by:
David Howells <dhowells@redhat.com> Signed-off-by:
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Eric Sesterhenn authored
Signed-off-by:
Eric Sesterhenn <snakebyte@gmx.de> Signed-off-by:
Alexey Dobriyan <adobriyan@gmail.com> Acked-By:
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Nick Piggin authored
Make radix tree lookups safe to be performed without locks. Readers are protected against nodes being deleted by using RCU based freeing. Readers are protected against new node insertion by using memory barriers to ensure the node itself will be properly written before it is visible in the radix tree. Each radix tree node keeps a record of their height (above leaf nodes). This height does not change after insertion -- when the radix tree is extended, higher nodes are only inserted in the top. So a lookup can take the pointer to what is *now* the root node, and traverse down it even if the tree is concurrently extended and this node becomes a subtree of a new root. "Direct" pointers (tree height of 0, where root->rnode points directly to the data item) are handled by using the low bit of the pointer to signal whether rnode is a direct pointer or a pointer to a radix tree node. When a reader wants to traverse the next branch, they will take a copy of the pointer. This pointer will be either NULL (and the branch is empty) or non-NULL (and will point to a valid node). [akpm@osdl.org: cleanups] [Lee.Schermerhorn@hp.com: bugfixes, comments, simplifications] [clameter@sgi.com: build fix] Signed-off-by:
Nick Piggin <npiggin@suse.de> Cc: "Paul E. McKenney" <paulmck@us.ibm.com> Signed-off-by:
Lee Schermerhorn <lee.schermerhorn@hp.com> Cc: Christoph Lameter <clameter@engr.sgi.com> Signed-off-by:
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Arnaldo Carvalho de Melo authored
Before: [acme@newtoy net-2.6.20]$ pahole --cacheline 32 kernel/sched.o mm_struct /* include2/asm/processor.h:542 */ struct mm_struct { struct vm_area_struct * mmap; /* 0 4 */ struct rb_root mm_rb; /* 4 4 */ struct vm_area_struct * mmap_cache; /* 8 4 */ long unsigned int (*get_unmapped_area)(); /* 12 4 */ void (*unmap_area)(); /* 16 4 */ long unsigned int mmap_base; /* 20 4 */ long unsigned int task_size; /* 24 4 */ long unsigned int cached_hole_size; /* 28 4 */ /* ---------- cacheline 1 boundary ---------- */ long unsigned int free_area_cache; /* 32 4 */ pgd_t * pgd; /* 36 4 */ atomic_t mm_users; /* 40 4 */ atomic_t mm_count; /* 44 4 */ int map_count; /* 48 4 */ struct rw_semaphore mmap_sem; /* 52 64 */ spinlock_t page_table_lock; /* 116 40 */ struct list_head mmlist; /* 156 8 */ mm_counter_t _file_rss; /* 164 4 */ mm_counter_t _anon_rss; /* 168 4 */ long unsigned int hiwater_rss; /* 172 4 */ long unsigned int hiwater_vm; /* 176 4 */ long unsigned int total_vm; /* 180 4 */ long unsigned int locked_vm; /* 184 4 */ long unsigned int shared_vm; /* 188 4 */ /* ---------- cacheline 6 boundary ---------- */ long unsigned int exec_vm; /* 192 4 */ long unsigned int stack_vm; /* 196 4 */ long unsigned int reserved_vm; /* 200 4 */ long unsigned int def_flags; /* 204 4 */ long unsigned int nr_ptes; /* 208 4 */ long unsigned int start_code; /* 212 4 */ long unsigned int end_code; /* 216 4 */ long unsigned int start_data; /* 220 4 */ /* ---------- cacheline 7 boundary ---------- */ long unsigned int end_data; /* 224 4 */ long unsigned int start_brk; /* 228 4 */ long unsigned int brk; /* 232 4 */ long unsigned int start_stack; /* 236 4 */ long unsigned int arg_start; /* 240 4 */ long unsigned int arg_end; /* 244 4 */ long unsigned int env_start; /* 248 4 */ long unsigned int env_end; /* 252 4 */ /* ---------- cacheline 8 boundary ---------- */ long unsigned int saved_auxv[44]; /* 256 176 */ unsigned int dumpable:2; /* 432 4 */ cpumask_t cpu_vm_mask; /* 436 4 */ mm_context_t context; /* 440 68 */ long unsigned int swap_token_time; /* 508 4 */ /* ---------- cacheline 16 boundary ---------- */ char recent_pagein; /* 512 1 */ /* XXX 3 bytes hole, try to pack */ int core_waiters; /* 516 4 */ struct completion * core_startup_done; /* 520 4 */ struct completion core_done; /* 524 52 */ rwlock_t ioctx_list_lock; /* 576 36 */ struct kioctx * ioctx_list; /* 612 4 */ }; /* size: 616, sum members: 613, holes: 1, sum holes: 3, cachelines: 20, last cacheline: 8 bytes */ After: [acme@newtoy net-2.6.20]$ pahole --cacheline 32 kernel/sched.o mm_struct /* include2/asm/processor.h:542 */ struct mm_struct { struct vm_area_struct * mmap; /* 0 4 */ struct rb_root mm_rb; /* 4 4 */ struct vm_area_struct * mmap_cache; /* 8 4 */ long unsigned int (*get_unmapped_area)(); /* 12 4 */ void (*unmap_area)(); /* 16 4 */ long unsigned int mmap_base; /* 20 4 */ long unsigned int task_size; /* 24 4 */ long unsigned int cached_hole_size; /* 28 4 */ /* ---------- cacheline 1 boundary ---------- */ long unsigned int free_area_cache; /* 32 4 */ pgd_t * pgd; /* 36 4 */ atomic_t mm_users; /* 40 4 */ atomic_t mm_count; /* 44 4 */ int map_count; /* 48 4 */ struct rw_semaphore mmap_sem; /* 52 64 */ spinlock_t page_table_lock; /* 116 40 */ struct list_head mmlist; /* 156 8 */ mm_counter_t _file_rss; /* 164 4 */ mm_counter_t _anon_rss; /* 168 4 */ long unsigned int hiwater_rss; /* 172 4 */ long unsigned int hiwater_vm; /* 176 4 */ long unsigned int total_vm; /* 180 4 */ long unsigned int locked_vm; /* 184 4 */ long unsigned int shared_vm; /* 188 4 */ /* ---------- cacheline 6 boundary ---------- */ long unsigned int exec_vm; /* 192 4 */ long unsigned int stack_vm; /* 196 4 */ long unsigned int reserved_vm; /* 200 4 */ long unsigned int def_flags; /* 204 4 */ long unsigned int nr_ptes; /* 208 4 */ long unsigned int start_code; /* 212 4 */ long unsigned int end_code; /* 216 4 */ long unsigned int start_data; /* 220 4 */ /* ---------- cacheline 7 boundary ---------- */ long unsigned int end_data; /* 224 4 */ long unsigned int start_brk; /* 228 4 */ long unsigned int brk; /* 232 4 */ long unsigned int start_stack; /* 236 4 */ long unsigned int arg_start; /* 240 4 */ long unsigned int arg_end; /* 244 4 */ long unsigned int env_start; /* 248 4 */ long unsigned int env_end; /* 252 4 */ /* ---------- cacheline 8 boundary ---------- */ long unsigned int saved_auxv[44]; /* 256 176 */ cpumask_t cpu_vm_mask; /* 432 4 */ mm_context_t context; /* 436 68 */ long unsigned int swap_token_time; /* 504 4 */ char recent_pagein; /* 508 1 */ unsigned char dumpable:2; /* 509 1 */ /* XXX 2 bytes hole, try to pack */ int core_waiters; /* 512 4 */ struct completion * core_startup_done; /* 516 4 */ struct completion core_done; /* 520 52 */ rwlock_t ioctx_list_lock; /* 572 36 */ struct kioctx * ioctx_list; /* 608 4 */ }; /* size: 612, sum members: 610, holes: 1, sum holes: 2, cachelines: 20, last cacheline: 4 bytes */ [acme@newtoy net-2.6.20]$ codiff -V /tmp/sched.o.before kernel/sched.o /pub/scm/linux/kernel/git/acme/net-2.6.20/kernel/sched.c: struct mm_struct | -4 dumpable:2; from: unsigned int /* 432(30) 4(2) */ to: unsigned char /* 509(6) 1(2) */ < SNIP other offset changes > 1 struct changed [acme@newtoy net-2.6.20]$ I'm not aware of any problem about using 2 byte wide bitfields where previously a 4 byte wide one was, holler if there is any, I wouldn't be surprised, bitfields are things from hell. For the curious, 432(30) means: at offset 432 from the struct start, at offset 30 in the bitfield (yeah, it comes backwards, hellish, huh?) ditto for 509(6), while 4(2) and 1(2) means "struct field size(bitfield size)". Now we have a 2 bytes hole and are using only 4 bytes of the last 32 bytes cacheline, any takers? :-) Signed-off-by:Arnaldo Carvalho de Melo <acme@mandriva.com> Signed-off-by:
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Andy Whitcroft authored
Currently we we use the lru head link of the second page of a compound page to hold its destructor. This was ok when it was purely an internal implmentation detail. However, hugetlbfs overrides this destructor violating the layering. Abstract this out as explicit calls, also introduce a type for the callback function allowing them to be type checked. For each callback we pre-declare the function, causing a type error on definition rather than on use elsewhere. [akpm@osdl.org: cleanups] Signed-off-by:
Andy Whitcroft <apw@shadowen.org> Signed-off-by:
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Christoph Lameter authored
Currently we simply attempt to allocate from all allowed nodes using GFP_THISNODE. However, GFP_THISNODE does not do reclaim (it wont do any at all if the recent GFP_THISNODE patch is accepted). If we truly run out of memory in the whole system then fallback_alloc may return NULL although memory may still be available if we would perform more thorough reclaim. This patch changes fallback_alloc() so that we first only inspect all the per node queues for available slabs. If we find any then we allocate from those. This avoids slab fragmentation by first getting rid of all partial allocated slabs on every node before allocating new memory. If we cannot satisfy the allocation from any per node queue then we extend a slab. We now call into the page allocator without specifying GFP_THISNODE. The page allocator will then implement its own fallback (in the given cpuset context), perform necessary reclaim (again considering not a single node but the whole set of allowed nodes) and then return pages for a new slab. We identify from which node the pages were allocated and then insert the pages into the corresponding per node structure. In order to do so we need to modify cache_grow() to take a parameter that specifies the new slab. kmem_getpages() can no longer set the GFP_THISNODE flag since we need to be able to use kmem_getpage to allocate from an arbitrary node. GFP_THISNODE needs to be specified when calling cache_grow(). One key advantage is that the decision from which node to allocate new memory is removed from slab fallback processing. The patch allows to go back to use of the page allocators fallback/reclaim logic. Signed-off-by:
Christoph Lameter <clameter@sgi.com> Signed-off-by:
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Christoph Lameter authored
The intent of GFP_THISNODE is to make sure that an allocation occurs on a particular node. If this is not possible then NULL needs to be returned so that the caller can choose what to do next on its own (the slab allocator depends on that). However, GFP_THISNODE currently triggers reclaim before returning a failure (GFP_THISNODE means GFP_NORETRY is set). If we have over allocated a node then we will currently do some reclaim before returning NULL. The caller may want memory from other nodes before reclaim should be triggered. (If the caller wants reclaim then he can directly use __GFP_THISNODE instead). There is no flag to avoid reclaim in the page allocator and adding yet another GFP_xx flag would be difficult given that we are out of available flags. So just compare and see if all bits for GFP_THISNODE (__GFP_THISNODE, __GFP_NORETRY and __GFP_NOWARN) are set. If so then we return NULL before waking up kswapd. Signed-off-by:
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Christoph Lameter authored
This addresses two issues: 1. Kmalloc_node() may intermittently return NULL if we are allocating from the current node and are unable to obtain memory for the current node from the page allocator. This is because we call ___cache_alloc() if nodeid == numa_node_id() and ____cache_alloc is not able to fallback to other nodes. This was introduced in the 2.6.19 development cycle. <= 2.6.18 in that case does not do a restricted allocation and blindly trusts the page allocator to have given us memory from the indicated node. It inserts the page regardless of the node it came from into the queues for the current node. 2. If kmalloc_node() is used on a node that has not been bootstrapped yet then we may try to pass an invalid node number to ____cache_alloc_node() triggering a BUG(). Change the function to call fallback_alloc() instead. Only call fallback_alloc() if we are allowed to fallback at all. The need to handle a node not bootstrapped yet also first surfaced in the 2.6.19 cycle. Update the comments since they were still describing the old kmalloc_node from 2.6.12. Signed-off-by:
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Andrew Morton authored
Cc: Christoph Lameter <clameter@sgi.com> Signed-off-by:
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Christoph Lameter authored
Replace all uses of kmem_cache_t with struct kmem_cache. The patch was generated using the following script: #!/bin/sh # # Replace one string by another in all the kernel sources. # set -e for file in `find * -name "*.c" -o -name "*.h"|xargs grep -l $1`; do quilt add $file sed -e "1,\$s/$1/$2/g" $file >/tmp/$$ mv /tmp/$$ $file quilt refresh done The script was run like this sh replace kmem_cache_t "struct kmem_cache" Signed-off-by:
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Christoph Lameter authored
SLAB_DMA is an alias of GFP_DMA. This is the last one so we remove the leftover comment too. Signed-off-by:
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Christoph Lameter authored
SLAB_KERNEL is an alias of GFP_KERNEL. Signed-off-by:
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Christoph Lameter authored
SLAB_ATOMIC is an alias of GFP_ATOMIC Signed-off-by:
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Christoph Lameter authored
SLAB_USER is an alias of GFP_USER Signed-off-by:
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Christoph Lameter authored
SLAB_NOFS is an alias of GFP_NOFS. Signed-off-by:
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Christoph Lameter authored
SLAB_NOIO is an alias of GFP_NOIO with a single instance of use. Signed-off-by:
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Christoph Lameter authored
SLAB_LEVEL_MASK is only used internally to the slab and is and alias of GFP_LEVEL_MASK. Signed-off-by:
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Christoph Lameter authored
It is only used internally in the slab. Signed-off-by:
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Hugh Dickins authored
David Binderman and his Intel C compiler rightly observe that install_file_pte no longer has any use for its pte_val. Signed-off-by:
Hugh Dickins <hugh@veritas.com> Cc: d binderman <dcb314@hotmail.com> Signed-off-by:
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Andy Whitcroft authored
These patches introduced new switch statements which are indented contrary to the concensus in mm/*.c. Fix them up to match that concensus. [PATCH] node local per-cpu-pages [PATCH] ZVC: Scale thresholds depending on the size of the system commit e7c8d5c9 commit df9ecabaSigned-off-by: -
Eric Sandeen authored
The fsfuzzer found this; with a corrupt small swapfile that claims to have many pages: [root]# file swap.741.img swap.741.img: Linux/i386 swap file (new style) 1 (4K pages) size 1040191487 pages [root]# ls -l swap.741.img -rw-r--r-- 1 root root 16777216 Nov 22 05:18 swap.741.img sys_swapon() will try to vmalloc all those pages, and -then- check to see if the file is actually that large: if (!(p->swap_map = vmalloc(maxpages * sizeof(short)))) { <snip> if (swapfilesize && maxpages > swapfilesize) { printk(KERN_WARNING "Swap area shorter than signature indicates\n"); It seems to me that it would make more sense to move this test up before the vmalloc, with the other checks, to avoid the OOM-killer in this situation... Signed-off-by:Eric Sandeen <sandeen@redhat.com> Cc: Hugh Dickins <hugh@veritas.com> Signed-off-by:
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Andy Whitcroft authored
x86 NUMA systems only define bootmem for node 0. alloc_bootmem_node() and friends therefore ignore the passed pgdat and use NODE_DATA(0) in all cases. This leads to the following warnings as we are not using the passed parameter: .../mm/page_alloc.c: In function 'zone_wait_table_init': .../mm/page_alloc.c:2259: warning: unused variable 'pgdat' One option would be to define all variables used with these macros __attribute__ ((unused)), but this would leave us exposed should these become genuinely unused. The key here is that we _are_ using the value, we ignore it but that is a deliberate action. This patch adds a nested local variable within the alloc_bootmem_node helper to which the pgdat parameter is assigned making it 'used'. The nested local is marked __attribute__ ((unused)) to silence this same warning for it. Signed-off-by:
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Andy Whitcroft authored
NUMA node ids are passed as either int or unsigned int almost exclusivly page_to_nid and zone_to_nid both return unsigned long. This is a throw back to when page_to_nid was a #define and was thus exposing the real type of the page flags field. In addition to fixing up the definitions of page_to_nid and zone_to_nid I audited the users of these functions identifying the following incorrect uses: 1) mm/page_alloc.c show_node() -- printk dumping the node id, 2) include/asm-ia64/pgalloc.h pgtable_quicklist_free() -- comparison against numa_node_id() which returns an int from cpu_to_node(), and 3) mm/mpolicy.c check_pte_range -- used as an index in node_isset which uses bit_set which in generic code takes an int. Signed-off-by:
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