include/linux/lru_cache.h

   1 /*
   2    lru_cache.c
   3
   4    This file is part of DRBD by Philipp Reisner and Lars Ellenberg.
   5
   6    Copyright (C) 2003-2008, LINBIT Information Technologies GmbH.
   7    Copyright (C) 2003-2008, Philipp Reisner <philipp.reisner@linbit.com>.
   8    Copyright (C) 2003-2008, Lars Ellenberg <lars.ellenberg@linbit.com>.
   9
  10    drbd is free software; you can redistribute it and/or modify
  11    it under the terms of the GNU General Public License as published by
  12    the Free Software Foundation; either version 2, or (at your option)
  13    any later version.
  14
  15    drbd is distributed in the hope that it will be useful,
  16    but WITHOUT ANY WARRANTY; without even the implied warranty of
  17    MERCHANTABILITY or FITNESS FOR A PARTICULAR PURPOSE.  See the
  18    GNU General Public License for more details.
  19
  20    You should have received a copy of the GNU General Public License
  21    along with drbd; see the file COPYING.  If not, write to
  22    the Free Software Foundation, 675 Mass Ave, Cambridge, MA 02139, USA.
  23
  24  */
  25
  26 #ifndef LRU_CACHE_H
  27 #define LRU_CACHE_H
  28
  29 #include <linux/list.h>
  30 #include <linux/slab.h>
  31 #include <linux/bitops.h>
  32 #include <linux/string.h> /* for memset */
  33 #include <linux/seq_file.h>
  34
  35 /*
  36 This header file (and its .c file; kernel-doc of functions see there)
  37   define a helper framework to easily keep track of index:label associations,
  38   and changes to an "active set" of objects, as well as pending transactions,
  39   to persistently record those changes.
  40
  41   We use an LRU policy if it is necessary to "cool down" a region currently in
  42   the active set before we can "heat" a previously unused region.
  43
  44   Because of this later property, it is called "lru_cache".
  45   As it actually Tracks Objects in an Active SeT, we could also call it
  46   toast (incidentally that is what may happen to the data on the
  47   backend storage uppon next resync, if we don't get it right).
  48
  49 What for?
  50
  51 We replicate IO (more or less synchronously) to local and remote disk.
  52
  53 For crash recovery after replication node failure,
  54   we need to resync all regions that have been target of in-flight WRITE IO
  55   (in use, or "hot", regions), as we don't know wether or not those WRITEs have
  56   made it to stable storage.
  57
  58   To avoid a "full resync", we need to persistently track these regions.
  59
  60   This is known as "write intent log", and can be implemented as on-disk
  61   (coarse or fine grained) bitmap, or other meta data.
  62
  63   To avoid the overhead of frequent extra writes to this meta data area,
  64   usually the condition is softened to regions that _may_ have been target of
  65   in-flight WRITE IO, e.g. by only lazily clearing the on-disk write-intent
  66   bitmap, trading frequency of meta data transactions against amount of
  67   (possibly unnecessary) resync traffic.
  68
  69   If we set a hard limit on the area that may be "hot" at any given time, we
  70   limit the amount of resync traffic needed for crash recovery.
  71
  72 For recovery after replication link failure,
  73   we need to resync all blocks that have been changed on the other replica
  74   in the mean time, or, if both replica have been changed independently [*],
  75   all blocks that have been changed on either replica in the mean time.
  76   [*] usually as a result of a cluster split-brain and insufficient protection.
  77       but there are valid use cases to do this on purpose.
  78
  79   Tracking those blocks can be implemented as "dirty bitmap".
  80   Having it fine-grained reduces the amount of resync traffic.
  81   It should also be persistent, to allow for reboots (or crashes)
  82   while the replication link is down.
  83
  84 There are various possible implementations for persistently storing
  85 write intent log information, three of which are mentioned here.
  86
  87 "Chunk dirtying"
  88   The on-disk "dirty bitmap" may be re-used as "write-intent" bitmap as well.
  89   To reduce the frequency of bitmap updates for write-intent log purposes,
  90   one could dirty "chunks" (of some size) at a time of the (fine grained)
  91   on-disk bitmap, while keeping the in-memory "dirty" bitmap as clean as
  92   possible, flushing it to disk again when a previously "hot" (and on-disk
  93   dirtied as full chunk) area "cools down" again (no IO in flight anymore,
  94   and none expected in the near future either).
  95
  96 "Explicit (coarse) write intent bitmap"
  97   An other implementation could chose a (probably coarse) explicit bitmap,
  98   for write-intent log purposes, additionally to the fine grained dirty bitmap.
  99
 100 "Activity log"
 101   Yet an other implementation may keep track of the hot regions, by starting
 102   with an empty set, and writing down a journal of region numbers that have
 103   become "hot", or have "cooled down" again.
 104
 105   To be able to use a ring buffer for this journal of changes to the active
 106   set, we not only record the actual changes to that set, but also record the
 107   not changing members of the set in a round robin fashion. To do so, we use a
 108   fixed (but configurable) number of slots which we can identify by index, and
 109   associate region numbers (labels) with these indices.
 110   For each transaction recording a change to the active set, we record the
 111   change itself (index: -old_label, +new_label), and which index is associated
 112   with which label (index: current_label) within a certain sliding window that
 113   is moved further over the available indices with each such transaction.
 114
 115   Thus, for crash recovery, if the ringbuffer is sufficiently large, we can
 116   accurately reconstruct the active set.
 117
 118   Sufficiently large depends only on maximum number of active objects, and the
 119   size of the sliding window recording "index: current_label" associations within
 120   each transaction.
 121
 122   This is what we call the "activity log".
 123
 124   Currently we need one activity log transaction per single label change, which
 125   does not give much benefit over the "dirty chunks of bitmap" approach, other
 126   than potentially less seeks.
 127
 128   We plan to change the transaction format to support multiple changes per
 129   transaction, which then would reduce several (disjoint, "random") updates to
 130   the bitmap into one transaction to the activity log ring buffer.
 131 */
 132
 133 /* this defines an element in a tracked set
 134  * .colision is for hash table lookup.
 135  * When we process a new IO request, we know its sector, thus can deduce the
 136  * region number (label) easily.  To do the label -> object lookup without a
 137  * full list walk, we use a simple hash table.
 138  *
 139  * .list is on one of three lists:
 140  *  in_use: currently in use (refcnt > 0, lc_number != LC_FREE)
 141  *     lru: unused but ready to be reused or recycled
 142  *          (ts_refcnt == 0, lc_number != LC_FREE),
 143  *    free: unused but ready to be recycled
 144  *          (ts_refcnt == 0, lc_number == LC_FREE),
 145  *
 146  * an element is said to be "in the active set",
 147  * if either on "in_use" or "lru", i.e. lc_number != LC_FREE.
 148  *
 149  * DRBD currently (May 2009) only uses 61 elements on the resync lru_cache
 150  * (total memory usage 2 pages), and up to 3833 elements on the act_log
 151  * lru_cache, totalling ~215 kB for 64bit architechture, ~53 pages.
 152  *
 153  * We usually do not actually free these objects again, but only "recycle"
 154  * them, as the change "index: -old_label, +LC_FREE" would need a transaction
 155  * as well.  Which also means that using a kmem_cache to allocate the objects
 156  * from wastes some resources.
 157  * But it avoids high order page allocations in kmalloc.
 158  */
 159 struct lc_element {
 160         struct hlist_node colision;
 161         struct list_head list;           /* LRU list or free list */
 162         unsigned refcnt;
 163         /* back "pointer" into ts_cache->element[index],
 164          * for paranoia, and for "ts_element_to_index" */
 165         unsigned lc_index;
 166         /* if we want to track a larger set of objects,
 167          * it needs to become arch independend u64 */
 168         unsigned lc_number;
 169
 170         /* special label when on free list */
 171 #define LC_FREE (~0U)
 172 };
 173
 174 struct lru_cache {
 175         /* the least recently used item is kept at lru->prev */
 176         struct list_head lru;
 177         struct list_head free;
 178         struct list_head in_use;
 179
 180         /* the pre-created kmem cache to allocate the objects from */
 181         struct kmem_cache *lc_cache;
 182
 183         /* size of tracked objects, used to memset(,0,) them in lc_reset */
 184         size_t element_size;
 185         /* offset of struct lc_element member in the tracked object */
 186         size_t element_off;
 187
 188         /* number of elements (indices) */
 189         unsigned int  nr_elements;
 190         /* Arbitrary limit on maximum tracked objects. Practical limit is much
 191          * lower due to allocation failures, probably. For typical use cases,
 192          * nr_elements should be a few thousand at most.
 193          * This also limits the maximum value of ts_element.ts_index, allowing the
 194          * 8 high bits of .ts_index to be overloaded with flags in the future. */
 195 #define LC_MAX_ACTIVE   (1<<24)
 196
 197         /* statistics */
 198         unsigned used; /* number of lelements currently on in_use list */
 199         unsigned long hits, misses, starving, dirty, changed;
 200
 201         /* see below: flag-bits for lru_cache */
 202         unsigned long flags;
 203
 204         /* when changing the label of an index element */
 205         unsigned int  new_number;
 206
 207         /* for paranoia when changing the label of an index element */
 208         struct lc_element *changing_element;
 209
 210         void  *lc_private;
 211         const char *name;
 212
 213         /* nr_elements there */
 214         struct hlist_head *lc_slot;
 215         struct lc_element **lc_element;
 216 };
 217
 218
 219 /* flag-bits for lru_cache */
 220 enum {
 221         /* debugging aid, to catch concurrent access early.
 222          * user needs to guarantee exclusive access by proper locking! */
 223         __LC_PARANOIA,
 224         /* if we need to change the set, but currently there is a changing
 225          * transaction pending, we are "dirty", and must deferr further
 226          * changing requests */
 227         __LC_DIRTY,
 228         /* if we need to change the set, but currently there is no free nor
 229          * unused element available, we are "starving", and must not give out
 230          * further references, to guarantee that eventually some refcnt will
 231          * drop to zero and we will be able to make progress again, changing
 232          * the set, writing the transaction.
 233          * if the statistics say we are frequently starving,
 234          * nr_elements is too small. */
 235         __LC_STARVING,
 236 };
 237 #define LC_PARANOIA (1<<__LC_PARANOIA)
 238 #define LC_DIRTY    (1<<__LC_DIRTY)
 239 #define LC_STARVING (1<<__LC_STARVING)
 240
 241 extern struct lru_cache *lc_create(const char *name, struct kmem_cache *cache,
 242                 unsigned e_count, size_t e_size, size_t e_off);
 243 extern void lc_reset(struct lru_cache *lc);
 244 extern void lc_destroy(struct lru_cache *lc);
 245 extern void lc_set(struct lru_cache *lc, unsigned int enr, int index);
 246 extern void lc_del(struct lru_cache *lc, struct lc_element *element);
 247
 248 extern struct lc_element *lc_try_get(struct lru_cache *lc, unsigned int enr);
 249 extern struct lc_element *lc_find(struct lru_cache *lc, unsigned int enr);
 250 extern struct lc_element *lc_get(struct lru_cache *lc, unsigned int enr);
 251 extern unsigned int lc_put(struct lru_cache *lc, struct lc_element *e);
 252 extern void lc_changed(struct lru_cache *lc, struct lc_element *e);
 253
 254 struct seq_file;
 255 extern size_t lc_seq_printf_stats(struct seq_file *seq, struct lru_cache *lc);
 256
 257 extern void lc_seq_dump_details(struct seq_file *seq, struct lru_cache *lc, char *utext,
 258                                 void (*detail) (struct seq_file *, struct lc_element *));
 259
 260 /**
 261  * lc_try_lock - can be used to stop lc_get() from changing the tracked set
 262  * @lc: the lru cache to operate on
 263  *
 264  * Note that the reference counts and order on the active and lru lists may
 265  * still change.  Returns true if we acquired the lock.
 266  */
 267 static inline int lc_try_lock(struct lru_cache *lc)
 268 {
 269         return !test_and_set_bit(__LC_DIRTY, &lc->flags);
 270 }
 271
 272 /**
 273  * lc_unlock - unlock @lc, allow lc_get() to change the set again
 274  * @lc: the lru cache to operate on
 275  */
 276 static inline void lc_unlock(struct lru_cache *lc)
 277 {
 278         clear_bit(__LC_DIRTY, &lc->flags);
 279         smp_mb__after_clear_bit();
 280 }
 281
 282 static inline int lc_is_used(struct lru_cache *lc, unsigned int enr)
 283 {
 284         struct lc_element *e = lc_find(lc, enr);
 285         return e && e->refcnt;
 286 }
 287
 288 #define lc_entry(ptr, type, member) \
 289         container_of(ptr, type, member)
 290
 291 extern struct lc_element *lc_element_by_index(struct lru_cache *lc, unsigned i);
 292 extern unsigned int lc_index_of(struct lru_cache *lc, struct lc_element *e);
 293
 294 #endif