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1/*
2 * Workingset detection
3 *
4 * Copyright (C) 2013 Red Hat, Inc., Johannes Weiner
5 */
6
7#include <linux/memcontrol.h>
8#include <linux/writeback.h>
9#include <linux/pagemap.h>
10#include <linux/atomic.h>
11#include <linux/module.h>
12#include <linux/swap.h>
13#include <linux/fs.h>
14#include <linux/mm.h>
15
16/*
17 * Double CLOCK lists
18 *
19 * Per zone, two clock lists are maintained for file pages: the
20 * inactive and the active list. Freshly faulted pages start out at
21 * the head of the inactive list and page reclaim scans pages from the
22 * tail. Pages that are accessed multiple times on the inactive list
23 * are promoted to the active list, to protect them from reclaim,
24 * whereas active pages are demoted to the inactive list when the
25 * active list grows too big.
26 *
27 * fault ------------------------+
28 * |
29 * +--------------+ | +-------------+
30 * reclaim <- | inactive | <-+-- demotion | active | <--+
31 * +--------------+ +-------------+ |
32 * | |
33 * +-------------- promotion ------------------+
34 *
35 *
36 * Access frequency and refault distance
37 *
38 * A workload is thrashing when its pages are frequently used but they
39 * are evicted from the inactive list every time before another access
40 * would have promoted them to the active list.
41 *
42 * In cases where the average access distance between thrashing pages
43 * is bigger than the size of memory there is nothing that can be
44 * done - the thrashing set could never fit into memory under any
45 * circumstance.
46 *
47 * However, the average access distance could be bigger than the
48 * inactive list, yet smaller than the size of memory. In this case,
49 * the set could fit into memory if it weren't for the currently
50 * active pages - which may be used more, hopefully less frequently:
51 *
52 * +-memory available to cache-+
53 * | |
54 * +-inactive------+-active----+
55 * a b | c d e f g h i | J K L M N |
56 * +---------------+-----------+
57 *
58 * It is prohibitively expensive to accurately track access frequency
59 * of pages. But a reasonable approximation can be made to measure
60 * thrashing on the inactive list, after which refaulting pages can be
61 * activated optimistically to compete with the existing active pages.
62 *
63 * Approximating inactive page access frequency - Observations:
64 *
65 * 1. When a page is accessed for the first time, it is added to the
66 * head of the inactive list, slides every existing inactive page
67 * towards the tail by one slot, and pushes the current tail page
68 * out of memory.
69 *
70 * 2. When a page is accessed for the second time, it is promoted to
71 * the active list, shrinking the inactive list by one slot. This
72 * also slides all inactive pages that were faulted into the cache
73 * more recently than the activated page towards the tail of the
74 * inactive list.
75 *
76 * Thus:
77 *
78 * 1. The sum of evictions and activations between any two points in
79 * time indicate the minimum number of inactive pages accessed in
80 * between.
81 *
82 * 2. Moving one inactive page N page slots towards the tail of the
83 * list requires at least N inactive page accesses.
84 *
85 * Combining these:
86 *
87 * 1. When a page is finally evicted from memory, the number of
88 * inactive pages accessed while the page was in cache is at least
89 * the number of page slots on the inactive list.
90 *
91 * 2. In addition, measuring the sum of evictions and activations (E)
92 * at the time of a page's eviction, and comparing it to another
93 * reading (R) at the time the page faults back into memory tells
94 * the minimum number of accesses while the page was not cached.
95 * This is called the refault distance.
96 *
97 * Because the first access of the page was the fault and the second
98 * access the refault, we combine the in-cache distance with the
99 * out-of-cache distance to get the complete minimum access distance
100 * of this page:
101 *
102 * NR_inactive + (R - E)
103 *
104 * And knowing the minimum access distance of a page, we can easily
105 * tell if the page would be able to stay in cache assuming all page
106 * slots in the cache were available:
107 *
108 * NR_inactive + (R - E) <= NR_inactive + NR_active
109 *
110 * which can be further simplified to
111 *
112 * (R - E) <= NR_active
113 *
114 * Put into words, the refault distance (out-of-cache) can be seen as
115 * a deficit in inactive list space (in-cache). If the inactive list
116 * had (R - E) more page slots, the page would not have been evicted
117 * in between accesses, but activated instead. And on a full system,
118 * the only thing eating into inactive list space is active pages.
119 *
120 *
121 * Activating refaulting pages
122 *
123 * All that is known about the active list is that the pages have been
124 * accessed more than once in the past. This means that at any given
125 * time there is actually a good chance that pages on the active list
126 * are no longer in active use.
127 *
128 * So when a refault distance of (R - E) is observed and there are at
129 * least (R - E) active pages, the refaulting page is activated
130 * optimistically in the hope that (R - E) active pages are actually
131 * used less frequently than the refaulting page - or even not used at
132 * all anymore.
133 *
134 * If this is wrong and demotion kicks in, the pages which are truly
135 * used more frequently will be reactivated while the less frequently
136 * used once will be evicted from memory.
137 *
138 * But if this is right, the stale pages will be pushed out of memory
139 * and the used pages get to stay in cache.
140 *
141 *
142 * Implementation
143 *
144 * For each zone's file LRU lists, a counter for inactive evictions
145 * and activations is maintained (zone->inactive_age).
146 *
147 * On eviction, a snapshot of this counter (along with some bits to
148 * identify the zone) is stored in the now empty page cache radix tree
149 * slot of the evicted page. This is called a shadow entry.
150 *
151 * On cache misses for which there are shadow entries, an eligible
152 * refault distance will immediately activate the refaulting page.
153 */
154
155#define EVICTION_SHIFT (RADIX_TREE_EXCEPTIONAL_ENTRY + \
156 ZONES_SHIFT + NODES_SHIFT + \
157 MEM_CGROUP_ID_SHIFT)
158#define EVICTION_MASK (~0UL >> EVICTION_SHIFT)
159
160/*
161 * Eviction timestamps need to be able to cover the full range of
162 * actionable refaults. However, bits are tight in the radix tree
163 * entry, and after storing the identifier for the lruvec there might
164 * not be enough left to represent every single actionable refault. In
165 * that case, we have to sacrifice granularity for distance, and group
166 * evictions into coarser buckets by shaving off lower timestamp bits.
167 */
168static unsigned int bucket_order __read_mostly;
169
170static void *pack_shadow(int memcgid, struct zone *zone, unsigned long eviction)
171{
172 eviction >>= bucket_order;
173 eviction = (eviction << MEM_CGROUP_ID_SHIFT) | memcgid;
174 eviction = (eviction << NODES_SHIFT) | zone_to_nid(zone);
175 eviction = (eviction << ZONES_SHIFT) | zone_idx(zone);
176 eviction = (eviction << RADIX_TREE_EXCEPTIONAL_SHIFT);
177
178 return (void *)(eviction | RADIX_TREE_EXCEPTIONAL_ENTRY);
179}
180
181static void unpack_shadow(void *shadow, int *memcgidp, struct zone **zonep,
182 unsigned long *evictionp)
183{
184 unsigned long entry = (unsigned long)shadow;
185 int memcgid, nid, zid;
186
187 entry >>= RADIX_TREE_EXCEPTIONAL_SHIFT;
188 zid = entry & ((1UL << ZONES_SHIFT) - 1);
189 entry >>= ZONES_SHIFT;
190 nid = entry & ((1UL << NODES_SHIFT) - 1);
191 entry >>= NODES_SHIFT;
192 memcgid = entry & ((1UL << MEM_CGROUP_ID_SHIFT) - 1);
193 entry >>= MEM_CGROUP_ID_SHIFT;
194
195 *memcgidp = memcgid;
196 *zonep = NODE_DATA(nid)->node_zones + zid;
197 *evictionp = entry << bucket_order;
198}
199
200/**
201 * workingset_eviction - note the eviction of a page from memory
202 * @mapping: address space the page was backing
203 * @page: the page being evicted
204 *
205 * Returns a shadow entry to be stored in @mapping->page_tree in place
206 * of the evicted @page so that a later refault can be detected.
207 */
208void *workingset_eviction(struct address_space *mapping, struct page *page)
209{
210 struct mem_cgroup *memcg = page_memcg(page);
211 struct zone *zone = page_zone(page);
212 int memcgid = mem_cgroup_id(memcg);
213 unsigned long eviction;
214 struct lruvec *lruvec;
215
216 /* Page is fully exclusive and pins page->mem_cgroup */
217 VM_BUG_ON_PAGE(PageLRU(page), page);
218 VM_BUG_ON_PAGE(page_count(page), page);
219 VM_BUG_ON_PAGE(!PageLocked(page), page);
220
221 lruvec = mem_cgroup_zone_lruvec(zone, memcg);
222 eviction = atomic_long_inc_return(&lruvec->inactive_age);
223 return pack_shadow(memcgid, zone, eviction);
224}
225
226/**
227 * workingset_refault - evaluate the refault of a previously evicted page
228 * @shadow: shadow entry of the evicted page
229 *
230 * Calculates and evaluates the refault distance of the previously
231 * evicted page in the context of the zone it was allocated in.
232 *
233 * Returns %true if the page should be activated, %false otherwise.
234 */
235bool workingset_refault(void *shadow)
236{
237 unsigned long refault_distance;
238 unsigned long active_file;
239 struct mem_cgroup *memcg;
240 unsigned long eviction;
241 struct lruvec *lruvec;
242 unsigned long refault;
243 struct zone *zone;
244 int memcgid;
245
246 unpack_shadow(shadow, &memcgid, &zone, &eviction);
247
248 rcu_read_lock();
249 /*
250 * Look up the memcg associated with the stored ID. It might
251 * have been deleted since the page's eviction.
252 *
253 * Note that in rare events the ID could have been recycled
254 * for a new cgroup that refaults a shared page. This is
255 * impossible to tell from the available data. However, this
256 * should be a rare and limited disturbance, and activations
257 * are always speculative anyway. Ultimately, it's the aging
258 * algorithm's job to shake out the minimum access frequency
259 * for the active cache.
260 *
261 * XXX: On !CONFIG_MEMCG, this will always return NULL; it
262 * would be better if the root_mem_cgroup existed in all
263 * configurations instead.
264 */
265 memcg = mem_cgroup_from_id(memcgid);
266 if (!mem_cgroup_disabled() && !memcg) {
267 rcu_read_unlock();
268 return false;
269 }
270 lruvec = mem_cgroup_zone_lruvec(zone, memcg);
271 refault = atomic_long_read(&lruvec->inactive_age);
272 active_file = lruvec_lru_size(lruvec, LRU_ACTIVE_FILE);
273 rcu_read_unlock();
274
275 /*
276 * The unsigned subtraction here gives an accurate distance
277 * across inactive_age overflows in most cases.
278 *
279 * There is a special case: usually, shadow entries have a
280 * short lifetime and are either refaulted or reclaimed along
281 * with the inode before they get too old. But it is not
282 * impossible for the inactive_age to lap a shadow entry in
283 * the field, which can then can result in a false small
284 * refault distance, leading to a false activation should this
285 * old entry actually refault again. However, earlier kernels
286 * used to deactivate unconditionally with *every* reclaim
287 * invocation for the longest time, so the occasional
288 * inappropriate activation leading to pressure on the active
289 * list is not a problem.
290 */
291 refault_distance = (refault - eviction) & EVICTION_MASK;
292
293 inc_zone_state(zone, WORKINGSET_REFAULT);
294
295 if (refault_distance <= active_file) {
296 inc_zone_state(zone, WORKINGSET_ACTIVATE);
297 return true;
298 }
299 return false;
300}
301
302/**
303 * workingset_activation - note a page activation
304 * @page: page that is being activated
305 */
306void workingset_activation(struct page *page)
307{
308 struct lruvec *lruvec;
309
310 lock_page_memcg(page);
311 /*
312 * Filter non-memcg pages here, e.g. unmap can call
313 * mark_page_accessed() on VDSO pages.
314 *
315 * XXX: See workingset_refault() - this should return
316 * root_mem_cgroup even for !CONFIG_MEMCG.
317 */
318 if (!mem_cgroup_disabled() && !page_memcg(page))
319 goto out;
320 lruvec = mem_cgroup_zone_lruvec(page_zone(page), page_memcg(page));
321 atomic_long_inc(&lruvec->inactive_age);
322out:
323 unlock_page_memcg(page);
324}
325
326/*
327 * Shadow entries reflect the share of the working set that does not
328 * fit into memory, so their number depends on the access pattern of
329 * the workload. In most cases, they will refault or get reclaimed
330 * along with the inode, but a (malicious) workload that streams
331 * through files with a total size several times that of available
332 * memory, while preventing the inodes from being reclaimed, can
333 * create excessive amounts of shadow nodes. To keep a lid on this,
334 * track shadow nodes and reclaim them when they grow way past the
335 * point where they would still be useful.
336 */
337
338struct list_lru workingset_shadow_nodes;
339
340static unsigned long count_shadow_nodes(struct shrinker *shrinker,
341 struct shrink_control *sc)
342{
343 unsigned long shadow_nodes;
344 unsigned long max_nodes;
345 unsigned long pages;
346
347 /* list_lru lock nests inside IRQ-safe mapping->tree_lock */
348 local_irq_disable();
349 shadow_nodes = list_lru_shrink_count(&workingset_shadow_nodes, sc);
350 local_irq_enable();
351
352 if (memcg_kmem_enabled())
353 pages = mem_cgroup_node_nr_lru_pages(sc->memcg, sc->nid,
354 LRU_ALL_FILE);
355 else
356 pages = node_page_state(sc->nid, NR_ACTIVE_FILE) +
357 node_page_state(sc->nid, NR_INACTIVE_FILE);
358
359 /*
360 * Active cache pages are limited to 50% of memory, and shadow
361 * entries that represent a refault distance bigger than that
362 * do not have any effect. Limit the number of shadow nodes
363 * such that shadow entries do not exceed the number of active
364 * cache pages, assuming a worst-case node population density
365 * of 1/8th on average.
366 *
367 * On 64-bit with 7 radix_tree_nodes per page and 64 slots
368 * each, this will reclaim shadow entries when they consume
369 * ~2% of available memory:
370 *
371 * PAGE_SIZE / radix_tree_nodes / node_entries / PAGE_SIZE
372 */
373 max_nodes = pages >> (1 + RADIX_TREE_MAP_SHIFT - 3);
374
375 if (shadow_nodes <= max_nodes)
376 return 0;
377
378 return shadow_nodes - max_nodes;
379}
380
381static enum lru_status shadow_lru_isolate(struct list_head *item,
382 struct list_lru_one *lru,
383 spinlock_t *lru_lock,
384 void *arg)
385{
386 struct address_space *mapping;
387 struct radix_tree_node *node;
388 unsigned int i;
389 int ret;
390
391 /*
392 * Page cache insertions and deletions synchroneously maintain
393 * the shadow node LRU under the mapping->tree_lock and the
394 * lru_lock. Because the page cache tree is emptied before
395 * the inode can be destroyed, holding the lru_lock pins any
396 * address_space that has radix tree nodes on the LRU.
397 *
398 * We can then safely transition to the mapping->tree_lock to
399 * pin only the address_space of the particular node we want
400 * to reclaim, take the node off-LRU, and drop the lru_lock.
401 */
402
403 node = container_of(item, struct radix_tree_node, private_list);
404 mapping = node->private_data;
405
406 /* Coming from the list, invert the lock order */
407 if (!spin_trylock(&mapping->tree_lock)) {
408 spin_unlock(lru_lock);
409 ret = LRU_RETRY;
410 goto out;
411 }
412
413 list_lru_isolate(lru, item);
414 spin_unlock(lru_lock);
415
416 /*
417 * The nodes should only contain one or more shadow entries,
418 * no pages, so we expect to be able to remove them all and
419 * delete and free the empty node afterwards.
420 */
421
422 BUG_ON(!node->count);
423 BUG_ON(node->count & RADIX_TREE_COUNT_MASK);
424
425 for (i = 0; i < RADIX_TREE_MAP_SIZE; i++) {
426 if (node->slots[i]) {
427 BUG_ON(!radix_tree_exceptional_entry(node->slots[i]));
428 node->slots[i] = NULL;
429 BUG_ON(node->count < (1U << RADIX_TREE_COUNT_SHIFT));
430 node->count -= 1U << RADIX_TREE_COUNT_SHIFT;
431 BUG_ON(!mapping->nrexceptional);
432 mapping->nrexceptional--;
433 }
434 }
435 BUG_ON(node->count);
436 inc_zone_state(page_zone(virt_to_page(node)), WORKINGSET_NODERECLAIM);
437 if (!__radix_tree_delete_node(&mapping->page_tree, node))
438 BUG();
439
440 spin_unlock(&mapping->tree_lock);
441 ret = LRU_REMOVED_RETRY;
442out:
443 local_irq_enable();
444 cond_resched();
445 local_irq_disable();
446 spin_lock(lru_lock);
447 return ret;
448}
449
450static unsigned long scan_shadow_nodes(struct shrinker *shrinker,
451 struct shrink_control *sc)
452{
453 unsigned long ret;
454
455 /* list_lru lock nests inside IRQ-safe mapping->tree_lock */
456 local_irq_disable();
457 ret = list_lru_shrink_walk(&workingset_shadow_nodes, sc,
458 shadow_lru_isolate, NULL);
459 local_irq_enable();
460 return ret;
461}
462
463static struct shrinker workingset_shadow_shrinker = {
464 .count_objects = count_shadow_nodes,
465 .scan_objects = scan_shadow_nodes,
466 .seeks = DEFAULT_SEEKS,
467 .flags = SHRINKER_NUMA_AWARE | SHRINKER_MEMCG_AWARE,
468};
469
470/*
471 * Our list_lru->lock is IRQ-safe as it nests inside the IRQ-safe
472 * mapping->tree_lock.
473 */
474static struct lock_class_key shadow_nodes_key;
475
476static int __init workingset_init(void)
477{
478 unsigned int timestamp_bits;
479 unsigned int max_order;
480 int ret;
481
482 BUILD_BUG_ON(BITS_PER_LONG < EVICTION_SHIFT);
483 /*
484 * Calculate the eviction bucket size to cover the longest
485 * actionable refault distance, which is currently half of
486 * memory (totalram_pages/2). However, memory hotplug may add
487 * some more pages at runtime, so keep working with up to
488 * double the initial memory by using totalram_pages as-is.
489 */
490 timestamp_bits = BITS_PER_LONG - EVICTION_SHIFT;
491 max_order = fls_long(totalram_pages - 1);
492 if (max_order > timestamp_bits)
493 bucket_order = max_order - timestamp_bits;
494 printk("workingset: timestamp_bits=%d max_order=%d bucket_order=%u\n",
495 timestamp_bits, max_order, bucket_order);
496
497 ret = list_lru_init_key(&workingset_shadow_nodes, &shadow_nodes_key);
498 if (ret)
499 goto err;
500 ret = register_shrinker(&workingset_shadow_shrinker);
501 if (ret)
502 goto err_list_lru;
503 return 0;
504err_list_lru:
505 list_lru_destroy(&workingset_shadow_nodes);
506err:
507 return ret;
508}
509module_init(workingset_init);
1/*
2 * Workingset detection
3 *
4 * Copyright (C) 2013 Red Hat, Inc., Johannes Weiner
5 */
6
7#include <linux/memcontrol.h>
8#include <linux/writeback.h>
9#include <linux/pagemap.h>
10#include <linux/atomic.h>
11#include <linux/module.h>
12#include <linux/swap.h>
13#include <linux/fs.h>
14#include <linux/mm.h>
15
16/*
17 * Double CLOCK lists
18 *
19 * Per zone, two clock lists are maintained for file pages: the
20 * inactive and the active list. Freshly faulted pages start out at
21 * the head of the inactive list and page reclaim scans pages from the
22 * tail. Pages that are accessed multiple times on the inactive list
23 * are promoted to the active list, to protect them from reclaim,
24 * whereas active pages are demoted to the inactive list when the
25 * active list grows too big.
26 *
27 * fault ------------------------+
28 * |
29 * +--------------+ | +-------------+
30 * reclaim <- | inactive | <-+-- demotion | active | <--+
31 * +--------------+ +-------------+ |
32 * | |
33 * +-------------- promotion ------------------+
34 *
35 *
36 * Access frequency and refault distance
37 *
38 * A workload is thrashing when its pages are frequently used but they
39 * are evicted from the inactive list every time before another access
40 * would have promoted them to the active list.
41 *
42 * In cases where the average access distance between thrashing pages
43 * is bigger than the size of memory there is nothing that can be
44 * done - the thrashing set could never fit into memory under any
45 * circumstance.
46 *
47 * However, the average access distance could be bigger than the
48 * inactive list, yet smaller than the size of memory. In this case,
49 * the set could fit into memory if it weren't for the currently
50 * active pages - which may be used more, hopefully less frequently:
51 *
52 * +-memory available to cache-+
53 * | |
54 * +-inactive------+-active----+
55 * a b | c d e f g h i | J K L M N |
56 * +---------------+-----------+
57 *
58 * It is prohibitively expensive to accurately track access frequency
59 * of pages. But a reasonable approximation can be made to measure
60 * thrashing on the inactive list, after which refaulting pages can be
61 * activated optimistically to compete with the existing active pages.
62 *
63 * Approximating inactive page access frequency - Observations:
64 *
65 * 1. When a page is accessed for the first time, it is added to the
66 * head of the inactive list, slides every existing inactive page
67 * towards the tail by one slot, and pushes the current tail page
68 * out of memory.
69 *
70 * 2. When a page is accessed for the second time, it is promoted to
71 * the active list, shrinking the inactive list by one slot. This
72 * also slides all inactive pages that were faulted into the cache
73 * more recently than the activated page towards the tail of the
74 * inactive list.
75 *
76 * Thus:
77 *
78 * 1. The sum of evictions and activations between any two points in
79 * time indicate the minimum number of inactive pages accessed in
80 * between.
81 *
82 * 2. Moving one inactive page N page slots towards the tail of the
83 * list requires at least N inactive page accesses.
84 *
85 * Combining these:
86 *
87 * 1. When a page is finally evicted from memory, the number of
88 * inactive pages accessed while the page was in cache is at least
89 * the number of page slots on the inactive list.
90 *
91 * 2. In addition, measuring the sum of evictions and activations (E)
92 * at the time of a page's eviction, and comparing it to another
93 * reading (R) at the time the page faults back into memory tells
94 * the minimum number of accesses while the page was not cached.
95 * This is called the refault distance.
96 *
97 * Because the first access of the page was the fault and the second
98 * access the refault, we combine the in-cache distance with the
99 * out-of-cache distance to get the complete minimum access distance
100 * of this page:
101 *
102 * NR_inactive + (R - E)
103 *
104 * And knowing the minimum access distance of a page, we can easily
105 * tell if the page would be able to stay in cache assuming all page
106 * slots in the cache were available:
107 *
108 * NR_inactive + (R - E) <= NR_inactive + NR_active
109 *
110 * which can be further simplified to
111 *
112 * (R - E) <= NR_active
113 *
114 * Put into words, the refault distance (out-of-cache) can be seen as
115 * a deficit in inactive list space (in-cache). If the inactive list
116 * had (R - E) more page slots, the page would not have been evicted
117 * in between accesses, but activated instead. And on a full system,
118 * the only thing eating into inactive list space is active pages.
119 *
120 *
121 * Activating refaulting pages
122 *
123 * All that is known about the active list is that the pages have been
124 * accessed more than once in the past. This means that at any given
125 * time there is actually a good chance that pages on the active list
126 * are no longer in active use.
127 *
128 * So when a refault distance of (R - E) is observed and there are at
129 * least (R - E) active pages, the refaulting page is activated
130 * optimistically in the hope that (R - E) active pages are actually
131 * used less frequently than the refaulting page - or even not used at
132 * all anymore.
133 *
134 * If this is wrong and demotion kicks in, the pages which are truly
135 * used more frequently will be reactivated while the less frequently
136 * used once will be evicted from memory.
137 *
138 * But if this is right, the stale pages will be pushed out of memory
139 * and the used pages get to stay in cache.
140 *
141 *
142 * Implementation
143 *
144 * For each zone's file LRU lists, a counter for inactive evictions
145 * and activations is maintained (zone->inactive_age).
146 *
147 * On eviction, a snapshot of this counter (along with some bits to
148 * identify the zone) is stored in the now empty page cache radix tree
149 * slot of the evicted page. This is called a shadow entry.
150 *
151 * On cache misses for which there are shadow entries, an eligible
152 * refault distance will immediately activate the refaulting page.
153 */
154
155static void *pack_shadow(unsigned long eviction, struct zone *zone)
156{
157 eviction = (eviction << NODES_SHIFT) | zone_to_nid(zone);
158 eviction = (eviction << ZONES_SHIFT) | zone_idx(zone);
159 eviction = (eviction << RADIX_TREE_EXCEPTIONAL_SHIFT);
160
161 return (void *)(eviction | RADIX_TREE_EXCEPTIONAL_ENTRY);
162}
163
164static void unpack_shadow(void *shadow,
165 struct zone **zone,
166 unsigned long *distance)
167{
168 unsigned long entry = (unsigned long)shadow;
169 unsigned long eviction;
170 unsigned long refault;
171 unsigned long mask;
172 int zid, nid;
173
174 entry >>= RADIX_TREE_EXCEPTIONAL_SHIFT;
175 zid = entry & ((1UL << ZONES_SHIFT) - 1);
176 entry >>= ZONES_SHIFT;
177 nid = entry & ((1UL << NODES_SHIFT) - 1);
178 entry >>= NODES_SHIFT;
179 eviction = entry;
180
181 *zone = NODE_DATA(nid)->node_zones + zid;
182
183 refault = atomic_long_read(&(*zone)->inactive_age);
184 mask = ~0UL >> (NODES_SHIFT + ZONES_SHIFT +
185 RADIX_TREE_EXCEPTIONAL_SHIFT);
186 /*
187 * The unsigned subtraction here gives an accurate distance
188 * across inactive_age overflows in most cases.
189 *
190 * There is a special case: usually, shadow entries have a
191 * short lifetime and are either refaulted or reclaimed along
192 * with the inode before they get too old. But it is not
193 * impossible for the inactive_age to lap a shadow entry in
194 * the field, which can then can result in a false small
195 * refault distance, leading to a false activation should this
196 * old entry actually refault again. However, earlier kernels
197 * used to deactivate unconditionally with *every* reclaim
198 * invocation for the longest time, so the occasional
199 * inappropriate activation leading to pressure on the active
200 * list is not a problem.
201 */
202 *distance = (refault - eviction) & mask;
203}
204
205/**
206 * workingset_eviction - note the eviction of a page from memory
207 * @mapping: address space the page was backing
208 * @page: the page being evicted
209 *
210 * Returns a shadow entry to be stored in @mapping->page_tree in place
211 * of the evicted @page so that a later refault can be detected.
212 */
213void *workingset_eviction(struct address_space *mapping, struct page *page)
214{
215 struct zone *zone = page_zone(page);
216 unsigned long eviction;
217
218 eviction = atomic_long_inc_return(&zone->inactive_age);
219 return pack_shadow(eviction, zone);
220}
221
222/**
223 * workingset_refault - evaluate the refault of a previously evicted page
224 * @shadow: shadow entry of the evicted page
225 *
226 * Calculates and evaluates the refault distance of the previously
227 * evicted page in the context of the zone it was allocated in.
228 *
229 * Returns %true if the page should be activated, %false otherwise.
230 */
231bool workingset_refault(void *shadow)
232{
233 unsigned long refault_distance;
234 struct zone *zone;
235
236 unpack_shadow(shadow, &zone, &refault_distance);
237 inc_zone_state(zone, WORKINGSET_REFAULT);
238
239 if (refault_distance <= zone_page_state(zone, NR_ACTIVE_FILE)) {
240 inc_zone_state(zone, WORKINGSET_ACTIVATE);
241 return true;
242 }
243 return false;
244}
245
246/**
247 * workingset_activation - note a page activation
248 * @page: page that is being activated
249 */
250void workingset_activation(struct page *page)
251{
252 atomic_long_inc(&page_zone(page)->inactive_age);
253}
254
255/*
256 * Shadow entries reflect the share of the working set that does not
257 * fit into memory, so their number depends on the access pattern of
258 * the workload. In most cases, they will refault or get reclaimed
259 * along with the inode, but a (malicious) workload that streams
260 * through files with a total size several times that of available
261 * memory, while preventing the inodes from being reclaimed, can
262 * create excessive amounts of shadow nodes. To keep a lid on this,
263 * track shadow nodes and reclaim them when they grow way past the
264 * point where they would still be useful.
265 */
266
267struct list_lru workingset_shadow_nodes;
268
269static unsigned long count_shadow_nodes(struct shrinker *shrinker,
270 struct shrink_control *sc)
271{
272 unsigned long shadow_nodes;
273 unsigned long max_nodes;
274 unsigned long pages;
275
276 /* list_lru lock nests inside IRQ-safe mapping->tree_lock */
277 local_irq_disable();
278 shadow_nodes = list_lru_count_node(&workingset_shadow_nodes, sc->nid);
279 local_irq_enable();
280
281 pages = node_present_pages(sc->nid);
282 /*
283 * Active cache pages are limited to 50% of memory, and shadow
284 * entries that represent a refault distance bigger than that
285 * do not have any effect. Limit the number of shadow nodes
286 * such that shadow entries do not exceed the number of active
287 * cache pages, assuming a worst-case node population density
288 * of 1/8th on average.
289 *
290 * On 64-bit with 7 radix_tree_nodes per page and 64 slots
291 * each, this will reclaim shadow entries when they consume
292 * ~2% of available memory:
293 *
294 * PAGE_SIZE / radix_tree_nodes / node_entries / PAGE_SIZE
295 */
296 max_nodes = pages >> (1 + RADIX_TREE_MAP_SHIFT - 3);
297
298 if (shadow_nodes <= max_nodes)
299 return 0;
300
301 return shadow_nodes - max_nodes;
302}
303
304static enum lru_status shadow_lru_isolate(struct list_head *item,
305 spinlock_t *lru_lock,
306 void *arg)
307{
308 struct address_space *mapping;
309 struct radix_tree_node *node;
310 unsigned int i;
311 int ret;
312
313 /*
314 * Page cache insertions and deletions synchroneously maintain
315 * the shadow node LRU under the mapping->tree_lock and the
316 * lru_lock. Because the page cache tree is emptied before
317 * the inode can be destroyed, holding the lru_lock pins any
318 * address_space that has radix tree nodes on the LRU.
319 *
320 * We can then safely transition to the mapping->tree_lock to
321 * pin only the address_space of the particular node we want
322 * to reclaim, take the node off-LRU, and drop the lru_lock.
323 */
324
325 node = container_of(item, struct radix_tree_node, private_list);
326 mapping = node->private_data;
327
328 /* Coming from the list, invert the lock order */
329 if (!spin_trylock(&mapping->tree_lock)) {
330 spin_unlock(lru_lock);
331 ret = LRU_RETRY;
332 goto out;
333 }
334
335 list_del_init(item);
336 spin_unlock(lru_lock);
337
338 /*
339 * The nodes should only contain one or more shadow entries,
340 * no pages, so we expect to be able to remove them all and
341 * delete and free the empty node afterwards.
342 */
343
344 BUG_ON(!node->count);
345 BUG_ON(node->count & RADIX_TREE_COUNT_MASK);
346
347 for (i = 0; i < RADIX_TREE_MAP_SIZE; i++) {
348 if (node->slots[i]) {
349 BUG_ON(!radix_tree_exceptional_entry(node->slots[i]));
350 node->slots[i] = NULL;
351 BUG_ON(node->count < (1U << RADIX_TREE_COUNT_SHIFT));
352 node->count -= 1U << RADIX_TREE_COUNT_SHIFT;
353 BUG_ON(!mapping->nrshadows);
354 mapping->nrshadows--;
355 }
356 }
357 BUG_ON(node->count);
358 inc_zone_state(page_zone(virt_to_page(node)), WORKINGSET_NODERECLAIM);
359 if (!__radix_tree_delete_node(&mapping->page_tree, node))
360 BUG();
361
362 spin_unlock(&mapping->tree_lock);
363 ret = LRU_REMOVED_RETRY;
364out:
365 local_irq_enable();
366 cond_resched();
367 local_irq_disable();
368 spin_lock(lru_lock);
369 return ret;
370}
371
372static unsigned long scan_shadow_nodes(struct shrinker *shrinker,
373 struct shrink_control *sc)
374{
375 unsigned long ret;
376
377 /* list_lru lock nests inside IRQ-safe mapping->tree_lock */
378 local_irq_disable();
379 ret = list_lru_walk_node(&workingset_shadow_nodes, sc->nid,
380 shadow_lru_isolate, NULL, &sc->nr_to_scan);
381 local_irq_enable();
382 return ret;
383}
384
385static struct shrinker workingset_shadow_shrinker = {
386 .count_objects = count_shadow_nodes,
387 .scan_objects = scan_shadow_nodes,
388 .seeks = DEFAULT_SEEKS,
389 .flags = SHRINKER_NUMA_AWARE,
390};
391
392/*
393 * Our list_lru->lock is IRQ-safe as it nests inside the IRQ-safe
394 * mapping->tree_lock.
395 */
396static struct lock_class_key shadow_nodes_key;
397
398static int __init workingset_init(void)
399{
400 int ret;
401
402 ret = list_lru_init_key(&workingset_shadow_nodes, &shadow_nodes_key);
403 if (ret)
404 goto err;
405 ret = register_shrinker(&workingset_shadow_shrinker);
406 if (ret)
407 goto err_list_lru;
408 return 0;
409err_list_lru:
410 list_lru_destroy(&workingset_shadow_nodes);
411err:
412 return ret;
413}
414module_init(workingset_init);