Cache replacement policies

The most efficient caching algorithm would be to always discard the information that will not be needed for the longest time in the future. This optimal result is referred to as Bélády's optimal algorithm/simply optimal replacement policy or the clairvoyant algorithm. Since it is generally impossible to predict how far in the future information will be needed, this is generally not implementable in practice. The practical minimum can be calculated only after experimentation, and one can compare the effectiveness of the actually chosen cache algorithm.

Optimal Working

At the moment when a page fault occurs, some set of pages is in memory. In the example, the sequence of '5', '0', '1' is accessed by Frame 1, Frame 2, Frame 3 respectively. Then when '2' is accessed, it replaces value '5', which is in frame 1 since it predicts that value '5' is not going to be accessed in the near future. Because a real-life general purpose operating system cannot actually predict when '5' will be accessed, Bélády's Algorithm cannot be implemented on such a system.

Using this algorithm the cache behaves in the same way as a FIFO queue. The cache evicts the blocks in the order they were added, without any regard to how often or how many times they were accessed before.

Using this algorithm the cache behaves in the same way as a stack and exact opposite way as a FIFO queue. The cache evicts the block added most recently first without any regard to how often or how many times it was accessed before.

Discards the least recently used items first. This algorithm requires keeping track of what was used when, which is expensive if one wants to make sure the algorithm always discards the least recently used item. General implementations of this technique require keeping "age bits" for cache-lines and track the "Least Recently Used" cache-line based on age-bits. In such an implementation, every time a cache-line is used, the age of all other cache-lines changes. LRU is actually a family of caching algorithms with members including 2Q by Theodore Johnson and Dennis Shasha,[3] and LRU/K by Pat O'Neil, Betty O'Neil and Gerhard Weikum.[4]

The access sequence for the below example is A B C D E D F.

LRU working

In the above example once A B C D gets installed in the blocks with sequence numbers (Increment 1 for each new Access) and when E is accessed, it is a miss and it needs to be installed in one of the blocks. According to the LRU Algorithm, since A has the lowest Rank(A(0)), E will replace A.

In the second last step D is accessed and therefore the sequence number is updated.

LRU, like many other replacement policies, can be characterized using a state transition field in a vector space, which decides the dynamic cache state changes similar to how an electromagnetic field determines the movement of a charged particle placed in it.[5]

The Time aware Least Recently Used (TLRU)[6] is a variant of LRU designed for the situation where the stored contents in cache have a valid life time. The algorithm is suitable in network cache applications, such as Information-centric networking (ICN), Content Delivery Networks (CDNs) and distributed networks in general. TLRU introduces a new term: TTU (Time to Use). TTU is a time stamp of a content/page which stipulates the usability time for the content based on the locality of the content and the content publisher announcement. Owing to this locality based time stamp, TTU provides more control to the local administrator to regulate in network storage. In the TLRU algorithm, when a piece of content arrives, a cache node calculates the local TTU value based on the TTU value assigned by the content publisher. The local TTU value is calculated by using a locally defined function. Once the local TTU value is calculated the replacement of content is performed on a subset of the total content stored in cache node. The TLRU ensures that less popular and small life content should be replaced with the incoming content.

Discards, in contrast to LRU, the most recently used items first. In findings presented at the 11th VLDB conference, Chou and DeWitt noted that "When a file is being repeatedly scanned in a [Looping Sequential] reference pattern, MRU is the best replacement algorithm."[7] Subsequently, other researchers presenting at the 22nd VLDB conference noted that for random access patterns and repeated scans over large datasets (sometimes known as cyclic access patterns) MRU cache algorithms have more hits than LRU due to their tendency to retain older data.[8] MRU algorithms are most useful in situations where the older an item is, the more likely it is to be accessed.

The access sequence for the below example is A B C D E C D B.

MRU working

Here, A B C D are placed in the cache as there is still space available. At the 5th access E, we see that the block which held D is now replaced with E as this block was used most recently. Another access to C and at the next access to D, C is replaced as it was the block accessed just before D and so on.

For CPU caches with large associativity (generally >4 ways), the implementation cost of LRU becomes prohibitive. In many CPU caches, a scheme that almost always discards one of the least recently used items is sufficient, so many CPU designers choose a PLRU algorithm which only needs one bit per cache item to work. PLRU typically has a slightly worse miss ratio, has a slightly better latency, uses slightly less power than LRU and lower overheads compared to LRU.

The following example shows how Bits work as a binary tree of 1-bit pointers that point to the less recently used subtree. Following the pointer chain to the leaf node identifies the replacement candidate. Upon an access all pointers in the chain from the accessed way's leaf node to the root node are set to point to subtree that does not contain the accessed way.

The access sequence is A B C D E.

Pseudo LRU working

The principle here is simple to understand if we only look at the arrow pointers. When there is an access to a value, say 'A', and we cannot find it in the cache, then we load it from memory and place it at the block where the arrows are currently pointing, going from top to bottom. After we have placed that block we flip those same arrows so they point the opposite way. In the above example we see how 'A' was placed, followed by 'B', 'C and 'D'. Then as the cache became full 'E' replaced 'A' because that was where the arrows were pointing at that time, and the arrows that led to 'A' were flipped to point in the opposite direction. The arrows then led to 'B', which will be the block replaced on the next cache miss.

Randomly selects a candidate item and discards it to make space when necessary. This algorithm does not require keeping any information about the access history. For its simplicity, it has been used in ARM processors.[9] It admits efficient stochastic simulation.[10]

The access sequence for the below example is A B C D E B D F

working of a Random Replacement algorithm

SLRU cache is divided into two segments, a probationary segment and a protected segment. Lines in each segment are ordered from the most to the least recently accessed. Data from misses is added to the cache at the most recently accessed end of the probationary segment. Hits are removed from wherever they currently reside and added to the most recently accessed end of the protected segment. Lines in the protected segment have thus been accessed at least twice. The protected segment is finite, so migration of a line from the probationary segment to the protected segment may force the migration of the LRU line in the protected segment to the most recently used (MRU) end of the probationary segment, giving this line another chance to be accessed before being replaced. The size limit on the protected segment is an SLRU parameter that varies according to the I/O workload patterns. Whenever data must be discarded from the cache, lines are obtained from the LRU end of the probationary segment.[11]

Counts how often an item is needed. Those that are used least often are discarded first. This works very similar to LRU except that instead of storing the value of how recently a block was accessed, we store the value of how many times it was accessed. So of course while running an access sequence we will replace a block which was used least number of times from our cache. E.g., if A was used (accessed) 5 times and B was used 3 times and others C and D were used 10 times each, we will replace B.

The Least Frequent Recently Used (LFRU)[12] cache replacement scheme combines the benefits of LFU and LRU schemes. LFRU is suitable for ‘in network’ cache applications, such as Information-centric networking (ICN), Content Delivery Networks (CDNs) and distributed networks in general. In LFRU, the cache is divided into two partitions called privileged and unprivileged partitions. The privileged partition can be defined as a protected partition. If content is highly popular, it is pushed into the privileged partition. Replacement of the privileged partition is done as follows: LFRU evicts content from the unprivileged partition, pushes content from privileged partition to unprivileged partition, and finally inserts new content into the privileged partition. In the above procedure the LRU is used for the privileged partition and an approximated LFU (ALFU) scheme is used for the unprivileged partition, hence the abbreviation LFRU.

The basic idea is to filter out the locally popular contents with ALFU scheme and push the popular contents to one of the privileged partition.

A variant called LFU with Dynamic Aging (LFUDA) that uses dynamic aging to accommodate shifts in the set of popular objects. It adds a cache age factor to the reference count when a new object is added to the cache or when an existing object is re-referenced. LFUDA increments the cache ages when evicting blocks by setting it to the evicted object’s key value. Thus, the cache age is always less than or equal to the minimum key value in the cache.[13] Suppose when an object was frequently accessed in the past and now it becomes unpopular, it will remain in the cache for a long time thereby preventing the newly or less popular objects from replacing it. So this Dynamic aging is introduced to bring down the count of such objects thereby making them eligible for replacement. The advantage of LFUDA is it reduces the cache pollution caused by LFU when cache sizes are very small. When Cache sizes are large few replacement decisions are sufficient and cache pollution will not be a problem.

LIRS is a page replacement algorithm with an improved performance over LRU and many other newer replacement algorithms. This is achieved by using reuse distance as a metric for dynamically ranking accessed pages to make a replacement decision.[14] LIRS effectively address the limits of LRU by using recency to evaluate Inter-Reference Recency (IRR) for making a replacement decision.

LIRS algorithm working

In the above figure, "x" represents that a block is accessed at time t. Suppose if block A1 is accessed at time 1 then Recency will become 0 since this is the first accessed block and IRR will be 1 since it predicts that A1 will be accessed again in time 3. In the time 2 since A4 is accessed, the recency will become 0 for A4 and 1 for A1 because A4 is the most recently accessed Object and IRR will become 4 and it will go on. At time 10, the LIRS algorithm will have two sets LIR set = {A1, A2} and HIR set = {A3, A4, A5}. Now at time 10 if there is access to A4, miss occurs. LIRS algorithm will now evict A5 instead of A2 because of its largest recency.

LRU algorithm cannot be directly implemented in the critical path of computer systems, such as operating systems, due to its high overhead. An approximation of LRU, called CLOCK is commonly used for the implementation. Similarly, CLOCK-Pro is an approximation of LIRS for an low cost implementation in systems.[15] CLOCK-Pro is under the basic CLOCK framework, but has three major distinct merits. First, CLOCK-Pro has three "clock hands" in contrast to a simple structure of CLOCK where only one "hand" is used. With the three hands, CLOCK-Pro is able to measure the reuse distance of data accesses in an approximate way. Second, all the merits of LIRS are retained, such as quickly evicting one-time accessing and/or low locality data items. Third, the complexity of the CLOCK-Pro is same as that of CLOCK, thus it is easy to implement at a low cost. The buffer cache replacement implementation in the current version of Linux is a combination of LRU and CLOCK-Pro.[16][17]

Constantly balances between LRU and LFU, to improve the combined result.[18] ARC improves on SLRU by using information about recently evicted cache items to dynamically adjust the size of the protected segment and the probationary segment to make the best use of the available cache space. Adaptive replacement algorithm is explained with the example.[19]

Uses recent hit/miss to adjust the jump where in climb any hit switches the position one slot to the top, and in LRU hit switches the position of the hit to the top. Thus, benefiting from the optimality of climb when the program is in a fixed scope, and the rapid adaption to a new scope, as LRU does. [20] Also support cache sharing among cores by releasing extras when the references are to the top part of the cache.

Combines the advantages of Adaptive Replacement Cache (ARC) and CLOCK. CAR has performance comparable to ARC, and substantially outperforms both LRU and CLOCK. Like ARC, CAR is self-tuning and requires no user-specified magic parameters. It uses 4 doubly linked lists: two clocks T1 and T2 and two simple LRU lists B1 and B2. T1 clock stores pages based on "recency" or "short term utility" whereas T2 stores pages with "frequency" or "long term utility". T1 and T2 contain those pages that are in the cache, while B1 and B2 contain pages that have recently been evicted from T1 and T2 respectively. The algorithm tries to maintain the size of these lists B1≈T2 and B2≈T1. New pages are inserted in T1 or T2. If there is a hit in B1 size of T1 is increased and similarly if there is a hit in B2 size of T1 is decreased. The adaptation rule used has the same principle as that in ARC, invest more in lists that will give more hits when more pages are added to it.

The multi queue algorithm or MQ was developed to improve the performance of second level buffer cache for e.g. a server buffer cache. It is introduced in a paper by Zhou, Philbin, and Li.[21] The MQ cache contains an m number of LRU queues: Q₀, Q₁, ..., Q_m-1. Here, the value of m represents a hierarchy based on the lifetime of all blocks in that particular queue. For example, if j>i, blocks in Q_j will have a longer lifetime than those in Q_i. In addition to these there is another history buffer Q_out, a queue which maintains a list of all the Block Identifiers along with their access frequencies. When Q_out is full the oldest identifier is evicted. Blocks stay in the LRU queues for a given lifetime, which is defined dynamically by the MQ algorithm to be the maximum temporal distance between two accesses to the same file or the number of cache blocks, whichever is larger. If a block has not been referenced within its lifetime, it is demoted from Q_i to Q_i−1 or evicted from the cache if it is in Q₀. Each queue also has a maximum access count; if a block in queue Q_i is accessed more than 2ⁱ times, this block is promoted to Q_i+1 until it is accessed more than 2ⁱ⁺¹ times or its lifetime expires. Within a given queue, blocks are ranked by the recency of access, according to LRU.[22]

Multi Queue Replacement

We can see from Fig. how the m LRU queues are placed in the cache. Also see from Fig. how the Q_out stores the block identifiers and their corresponding access frequencies. a was placed in Q₀ as it was accessed only once recently and we can check in Q_out how b and c were placed in Q₁ and Q₂ respectively as their access frequencies are 2 and 4. The queue in which a block is placed is dependent on access frequency(f) as log₂(f). When the cache is full, the first block to be evicted will be the head of Q₀ in this case a. If a is accessed one more time it will move to Q₁ below b.

Pannier [23] is a container-based flash caching mechanism that identifies divergent (heterogeneous) containers where blocks held therein have highly varying access patterns. Pannier uses a priority-queue based survival queue structure to rank the containers based on their survival time, which is proportional to the live data in the container. Pannier is built based on Segmented LRU (S2LRU), which segregates hot and cold data. Pannier also uses a multi-step feedback controller to throttle flash writes to ensure flash lifespan.