* SLUB assigns one slab for allocation to each processor.
* Allocations only occur from these slabs called cpu slabs.
*
- * Slabs with free elements are kept on a partial list.
- * There is no list for full slabs. If an object in a full slab is
+ * Slabs with free elements are kept on a partial list and during regular
+ * operations no list for full slabs is used. If an object in a full slab is
* freed then the slab will show up again on the partial lists.
- * Otherwise there is no need to track full slabs unless we have to
- * track full slabs for debugging purposes.
+ * We track full slabs for debugging purposes though because otherwise we
+ * cannot scan all objects.
*
* Slabs are freed when they become empty. Teardown and setup is
* minimal so we rely on the page allocators per cpu caches for
*
* - The per cpu array is updated for each new slab and and is a remote
* cacheline for most nodes. This could become a bouncing cacheline given
- * enough frequent updates. There are 16 pointers in a cacheline.so at
- * max 16 cpus could compete. Likely okay.
+ * enough frequent updates. There are 16 pointers in a cacheline, so at
+ * max 16 cpus could compete for the cacheline which may be okay.
*
* - Support PAGE_ALLOC_DEBUG. Should be easy to do.
*
#define DEBUG_DEFAULT_FLAGS (SLAB_DEBUG_FREE | SLAB_RED_ZONE | \
SLAB_POISON | SLAB_STORE_USER)
+
/*
* Set of flags that will prevent slab merging
*/
static enum {
DOWN, /* No slab functionality available */
PARTIAL, /* kmem_cache_open() works but kmalloc does not */
- UP, /* Everything works */
+ UP, /* Everything works but does not show up in sysfs */
SYSFS /* Sysfs up */
} slab_state = DOWN;
/*
* Slow version of get and set free pointer.
*
- * This requires touching the cache lines of kmem_cache.
- * The offset can also be obtained from the page. In that
- * case it is in the cacheline that we already need to touch.
+ * This version requires touching the cache lines of kmem_cache which
+ * we avoid to do in the fast alloc free paths. There we obtain the offset
+ * from the page struct.
*/
static void *get_freepointer(struct kmem_cache *s, void *object)
{
* Bytes of the object to be managed.
* If the freepointer may overlay the object then the free
* pointer is the first word of the object.
+ *
* Poisoning uses 0x6b (POISON_FREE) and the last byte is
* 0xa5 (POISON_END)
*
* object + s->objsize
* Padding to reach word boundary. This is also used for Redzoning.
- * Padding is extended to word size if Redzoning is enabled
- * and objsize == inuse.
+ * Padding is extended by another word if Redzoning is enabled and
+ * objsize == inuse.
+ *
* We fill with 0xbb (RED_INACTIVE) for inactive objects and with
* 0xcc (RED_ACTIVE) for objects in use.
*
* object + s->inuse
+ * Meta data starts here.
+ *
* A. Free pointer (if we cannot overwrite object on free)
* B. Tracking data for SLAB_STORE_USER
- * C. Padding to reach required alignment boundary
- * Padding is done using 0x5a (POISON_INUSE)
+ * C. Padding to reach required alignment boundary or at mininum
+ * one word if debuggin is on to be able to detect writes
+ * before the word boundary.
+ *
+ * Padding is done using 0x5a (POISON_INUSE)
*
* object + s->size
+ * Nothing is used beyond s->size.
*
- * If slabcaches are merged then the objsize and inuse boundaries are to
- * be ignored. And therefore no slab options that rely on these boundaries
+ * If slabcaches are merged then the objsize and inuse boundaries are mostly
+ * ignored. And therefore no slab options that rely on these boundaries
* may be used with merged slabcaches.
*/
/*
* No choice but to zap it and thus loose the remainder
* of the free objects in this slab. May cause
- * another error because the object count maybe
- * wrong now.
+ * another error because the object count is now wrong.
*/
set_freepointer(s, p, NULL);
return 0;
}
/*
- * Determine if a certain object on a page is on the freelist and
- * therefore free. Must hold the slab lock for cpu slabs to
- * guarantee that the chains are consistent.
+ * Determine if a certain object on a page is on the freelist. Must hold the
+ * slab lock to guarantee that the chains are in a consistent state.
*/
static int on_freelist(struct kmem_cache *s, struct page *page, void *search)
{
}
/*
- * Tracking of fully allocated slabs for debugging
+ * Tracking of fully allocated slabs for debugging purposes.
*/
static void add_full(struct kmem_cache_node *n, struct page *page)
{
/*
* If this is a slab page then lets do the best we can
* to avoid issues in the future. Marking all objects
- * as used avoids touching the remainder.
+ * as used avoids touching the remaining objects.
*/
printk(KERN_ERR "@@@ SLUB: %s slab 0x%p. Marking all objects used.\n",
s->name, page);
}
/*
- * Lock page and remove it from the partial list
+ * Lock slab and remove from the partial list.
*
- * Must hold list_lock
+ * Must hold list_lock.
*/
static int lock_and_del_slab(struct kmem_cache_node *n, struct page *page)
{
}
/*
- * Try to get a partial slab from a specific node
+ * Try to allocate a partial slab from a specific node.
*/
static struct page *get_partial_node(struct kmem_cache_node *n)
{
/*
* Racy check. If we mistakenly see no partial slabs then we
* just allocate an empty slab. If we mistakenly try to get a
- * partial slab then get_partials() will return NULL.
+ * partial slab and there is none available then get_partials()
+ * will return NULL.
*/
if (!n || !n->nr_partial)
return NULL;
}
/*
- * Get a page from somewhere. Search in increasing NUMA
- * distances.
+ * Get a page from somewhere. Search in increasing NUMA distances.
*/
static struct page *get_any_partial(struct kmem_cache *s, gfp_t flags)
{
struct page *page;
/*
- * The defrag ratio allows to configure the tradeoffs between
- * inter node defragmentation and node local allocations.
- * A lower defrag_ratio increases the tendency to do local
- * allocations instead of scanning throught the partial
- * lists on other nodes.
+ * The defrag ratio allows a configuration of the tradeoffs between
+ * inter node defragmentation and node local allocations. A lower
+ * defrag_ratio increases the tendency to do local allocations
+ * instead of attempting to obtain partial slabs from other nodes.
*
- * If defrag_ratio is set to 0 then kmalloc() always
- * returns node local objects. If its higher then kmalloc()
- * may return off node objects in order to avoid fragmentation.
- *
- * A higher ratio means slabs may be taken from other nodes
- * thus reducing the number of partial slabs on those nodes.
+ * If the defrag_ratio is set to 0 then kmalloc() always
+ * returns node local objects. If the ratio is higher then kmalloc()
+ * may return off node objects because partial slabs are obtained
+ * from other nodes and filled up.
*
* If /sys/slab/xx/defrag_ratio is set to 100 (which makes
- * defrag_ratio = 1000) then every (well almost) allocation
- * will first attempt to defrag slab caches on other nodes. This
- * means scanning over all nodes to look for partial slabs which
- * may be a bit expensive to do on every slab allocation.
+ * defrag_ratio = 1000) then every (well almost) allocation will
+ * first attempt to defrag slab caches on other nodes. This means
+ * scanning over all nodes to look for partial slabs which may be
+ * expensive if we do it every time we are trying to find a slab
+ * with available objects.
*/
if (!s->defrag_ratio || get_cycles() % 1024 > s->defrag_ratio)
return NULL;
} else {
if (n->nr_partial < MIN_PARTIAL) {
/*
- * Adding an empty page to the partial slabs in order
- * to avoid page allocator overhead. This page needs to
- * come after all the others that are not fully empty
- * in order to make sure that we do maximum
- * defragmentation.
+ * Adding an empty slab to the partial slabs in order
+ * to avoid page allocator overhead. This slab needs
+ * to come after the other slabs with objects in
+ * order to fill them up. That way the size of the
+ * partial list stays small. kmem_cache_shrink can
+ * reclaim empty slabs from the partial list.
*/
add_partial_tail(n, page);
slab_unlock(page);
* 1. The page struct
* 2. The first cacheline of the object to be allocated.
*
- * The only cache lines that are read (apart from code) is the
+ * The only other cache lines that are read (apart from code) is the
* per cpu array in the kmem_cache struct.
*
* Fastpath is not possible if we need to get a new slab or have
cpu = smp_processor_id();
if (s->cpu_slab[cpu]) {
/*
- * Someone else populated the cpu_slab while we enabled
- * interrupts, or we have got scheduled on another cpu.
- * The page may not be on the requested node.
+ * Someone else populated the cpu_slab while we
+ * enabled interrupts, or we have gotten scheduled
+ * on another cpu. The page may not be on the
+ * requested node even if __GFP_THISNODE was
+ * specified. So we need to recheck.
*/
if (node == -1 ||
page_to_nid(s->cpu_slab[cpu]) == node) {
slab_lock(page);
goto redo;
}
- /* Dump the current slab */
+ /* New slab does not fit our expectations */
flush_slab(s, s->cpu_slab[cpu], cpu);
}
slab_lock(page);
* The fastpath only writes the cacheline of the page struct and the first
* cacheline of the object.
*
- * No special cachelines need to be read
+ * We read the cpu_slab cacheline to check if the slab is the per cpu
+ * slab for this processor.
*/
static void slab_free(struct kmem_cache *s, struct page *page,
void *x, void *addr)
slab_empty:
if (prior)
/*
- * Slab on the partial list.
+ * Slab still on the partial list.
*/
remove_partial(s, page);
}
/*
- * kmem_cache_open produces objects aligned at "size" and the first object
- * is placed at offset 0 in the slab (We have no metainformation on the
- * slab, all slabs are in essence "off slab").
- *
- * In order to get the desired alignment one just needs to align the
- * size.
+ * Object placement in a slab is made very easy because we always start at
+ * offset 0. If we tune the size of the object to the alignment then we can
+ * get the required alignment by putting one properly sized object after
+ * another.
*
* Notice that the allocation order determines the sizes of the per cpu
* caches. Each processor has always one slab available for allocations.
* Increasing the allocation order reduces the number of times that slabs
- * must be moved on and off the partial lists and therefore may influence
+ * must be moved on and off the partial lists and is therefore a factor in
* locking overhead.
- *
- * The offset is used to relocate the free list link in each object. It is
- * therefore possible to move the free list link behind the object. This
- * is necessary for RCU to work properly and also useful for debugging.
*/
/*
*/
static int slub_min_order;
static int slub_max_order = DEFAULT_MAX_ORDER;
-
-/*
- * Minimum number of objects per slab. This is necessary in order to
- * reduce locking overhead. Similar to the queue size in SLAB.
- */
static int slub_min_objects = DEFAULT_MIN_OBJECTS;
/*
* Merge control. If this is set then no merging of slab caches will occur.
+ * (Could be removed. This was introduced to pacify the merge skeptics.)
*/
static int slub_nomerge;
/*
* Calculate the order of allocation given an slab object size.
*
- * The order of allocation has significant impact on other elements
- * of the system. Generally order 0 allocations should be preferred
- * since they do not cause fragmentation in the page allocator. Larger
- * objects may have problems with order 0 because there may be too much
- * space left unused in a slab. We go to a higher order if more than 1/8th
- * of the slab would be wasted.
+ * The order of allocation has significant impact on performance and other
+ * system components. Generally order 0 allocations should be preferred since
+ * order 0 does not cause fragmentation in the page allocator. Larger objects
+ * be problematic to put into order 0 slabs because there may be too much
+ * unused space left. We go to a higher order if more than 1/8th of the slab
+ * would be wasted.
+ *
+ * In order to reach satisfactory performance we must ensure that a minimum
+ * number of objects is in one slab. Otherwise we may generate too much
+ * activity on the partial lists which requires taking the list_lock. This is
+ * less a concern for large slabs though which are rarely used.
*
- * In order to reach satisfactory performance we must ensure that
- * a minimum number of objects is in one slab. Otherwise we may
- * generate too much activity on the partial lists. This is less a
- * concern for large slabs though. slub_max_order specifies the order
- * where we begin to stop considering the number of objects in a slab.
+ * slub_max_order specifies the order where we begin to stop considering the
+ * number of objects in a slab as critical. If we reach slub_max_order then
+ * we try to keep the page order as low as possible. So we accept more waste
+ * of space in favor of a small page order.
*
- * Higher order allocations also allow the placement of more objects
- * in a slab and thereby reduce object handling overhead. If the user
- * has requested a higher mininum order then we start with that one
- * instead of zero.
+ * Higher order allocations also allow the placement of more objects in a
+ * slab and thereby reduce object handling overhead. If the user has
+ * requested a higher mininum order then we start with that one instead of
+ * the smallest order which will fit the object.
*/
static int calculate_order(int size)
{
rem = slab_size % size;
- if (rem <= (PAGE_SIZE << order) / 8)
+ if (rem <= slab_size / 8)
break;
}
if (order >= MAX_ORDER)
return -E2BIG;
+
return order;
}
/*
- * Function to figure out which alignment to use from the
- * various ways of specifying it.
+ * Figure out what the alignment of the objects will be.
*/
static unsigned long calculate_alignment(unsigned long flags,
unsigned long align, unsigned long size)
size = ALIGN(size, sizeof(void *));
/*
- * If we are redzoning then check if there is some space between the
+ * If we are Redzoning then check if there is some space between the
* end of the object and the free pointer. If not then add an
- * additional word, so that we can establish a redzone between
- * the object and the freepointer to be able to check for overwrites.
+ * additional word to have some bytes to store Redzone information.
*/
if ((flags & SLAB_RED_ZONE) && size == s->objsize)
size += sizeof(void *);
/*
- * With that we have determined how much of the slab is in actual
- * use by the object. This is the potential offset to the free
- * pointer.
+ * With that we have determined the number of bytes in actual use
+ * by the object. This is the potential offset to the free pointer.
*/
s->inuse = size;
* of the object.
*/
size += sizeof(void *);
+
/*
* Determine the alignment based on various parameters that the
* user specified and the dynamic determination of cache line size
int kmem_ptr_validate(struct kmem_cache *s, const void *object)
{
struct page * page;
- void *addr;
page = get_object_page(object);
EXPORT_SYMBOL(kmem_cache_name);
/*
- * Attempt to free all slabs on a node
+ * Attempt to free all slabs on a node. Return the number of slabs we
+ * were unable to free.
*/
static int free_list(struct kmem_cache *s, struct kmem_cache_node *n,
struct list_head *list)
}
/*
- * Release all resources used by slab cache
+ * Release all resources used by a slab cache.
*/
static int kmem_cache_close(struct kmem_cache *s)
{
EXPORT_SYMBOL(kfree);
/*
- * kmem_cache_shrink removes empty slabs from the partial lists
- * and then sorts the partially allocated slabs by the number
- * of items in use. The slabs with the most items in use
- * come first. New allocations will remove these from the
- * partial list because they are full. The slabs with the
- * least items are placed last. If it happens that the objects
- * are freed then the page can be returned to the page allocator.
+ * kmem_cache_shrink removes empty slabs from the partial lists and sorts
+ * the remaining slabs by the number of items in use. The slabs with the
+ * most items in use come first. New allocations will then fill those up
+ * and thus they can be removed from the partial lists.
+ *
+ * The slabs with the least items are placed last. This results in them
+ * being allocated from last increasing the chance that the last objects
+ * are freed in them.
*/
int kmem_cache_shrink(struct kmem_cache *s)
{
spin_lock_irqsave(&n->list_lock, flags);
/*
- * Build lists indexed by the items in use in
- * each slab or free slabs if empty.
+ * Build lists indexed by the items in use in each slab.
*
- * Note that concurrent frees may occur while
- * we hold the list_lock. page->inuse here is
- * the upper limit.
+ * Note that concurrent frees may occur while we hold the
+ * list_lock. page->inuse here is the upper limit.
*/
list_for_each_entry_safe(page, t, &n->partial, lru) {
if (!page->inuse && slab_trylock(page)) {
goto out;
/*
- * Rebuild the partial list with the slabs filled up
- * most first and the least used slabs at the end.
+ * Rebuild the partial list with the slabs filled up most
+ * first and the least used slabs at the end.
*/
for (i = s->objects - 1; i >= 0; i--)
list_splice(slabs_by_inuse + i, n->partial.prev);
#ifdef CONFIG_NUMA
/*
* Must first have the slab cache available for the allocations of the
- * struct kmalloc_cache_node's. There is special bootstrap code in
+ * struct kmem_cache_node's. There is special bootstrap code in
* kmem_cache_open for slab_state == DOWN.
*/
create_kmalloc_cache(&kmalloc_caches[0], "kmem_cache_node",
}
/*
- * Use the cpu notifier to insure that the slab are flushed
- * when necessary.
+ * Use the cpu notifier to insure that the cpu slabs are flushed when
+ * necessary.
*/
static int __cpuinit slab_cpuup_callback(struct notifier_block *nfb,
unsigned long action, void *hcpu)
static void resiliency_test(void) {};
#endif
-/*
- * These are not as efficient as kmalloc for the non debug case.
- * We do not have the page struct available so we have to touch one
- * cacheline in struct kmem_cache to check slab flags.
- */
void *__kmalloc_track_caller(size_t size, gfp_t gfpflags, void *caller)
{
struct kmem_cache *s = get_slab(size, gfpflags);
}
/*
- * Generate lists of locations where slabcache objects are allocated
+ * Generate lists of code addresses where slabcache objects are allocated
* and freed.
*/
}
/*
- * Not found. Insert new tracking element
+ * Not found. Insert new tracking element.
*/
if (t->count >= t->max && !alloc_loc_track(t, 2 * t->max))
return 0;
projects / platform / upstream / kernel-adaptation-pc.git / commitdiff