Example of merge sort sorting a list of random dots. 

Class  Sorting algorithm 

Data structure  Array 
Worst case performance  Θ(nlogn) 
Best case performance  Θ(nlogn) typical, Θ(n) natural variant 
Average case performance  Θ(nlogn) 
Worst case space complexity  Θ(n) auxiliary 
Merge sort is an O(n log n) comparisonbased sorting algorithm. In most implementations it is stable, meaning that it preserves the input order of equal elements in the sorted output. It is an example of the divide and conquer algorithmic paradigm. It was invented by John von Neumann in 1945.
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Conceptually, a merge sort works as follows
Merge sort incorporates two main ideas to improve its runtime:
Example: Using merge sort to sort a list of integers contained in an array:
Suppose we have an array A with n indices ranging from A_{0} to A_{n − 1}. We apply merge sort to A(A_{0}..A_{c − 1}) and A(A_{c}..A_{n − 1}) where c is the integer part of n / 2. When the two halves are returned they will have been sorted. They can now be merged together to form a sorted array.
In a simple pseudocode form, the algorithm could look something like this:
function merge_sort(m) if length(m) ≤ 1 return m var list left, right, result var integer middle = length(m) / 2 for each x in m up to middle add x to left for each x in m after middle add x to right left = merge_sort(left) right = merge_sort(right) if left.last_item > right.first_item result = merge(left, right) else result = append(left, right) return result
Following writing merge_sort function, then it is required to merge both the left and right lists created above.There are several variants for the merge()
function, the simplest variant could look like this:
function merge(left,right) var list result while length(left) > 0 and length(right) > 0 if first(left) ≤ first(right) append first(left) to result left = rest(left) else append first(right) to result right = rest(right) end while if length(left) > 0 append left to result else append right to result return result
In sorting n objects, merge sort has an average and worstcase performance of O(n log n). If the running time of merge sort for a list of length n is T(n), then the recurrence T(n) = 2T(n/2) + n follows from the definition of the algorithm (apply the algorithm to two lists of half the size of the original list, and add the n steps taken to merge the resulting two lists). The closed form follows from the master theorem.
In the worst case, merge sort does an amount of comparisons equal to or slightly smaller than (n ⌈lg n⌉  2^{⌈lg n⌉} + 1), which is between (n lg n  n + 1) and (n lg n + n + O(lg n)). ^{[1]}
For large n and a randomly ordered input list, merge sort's expected (average) number of comparisons approaches α·n fewer than the worst case where
In the worst case, merge sort does about 39% fewer comparisons than quicksort does in the average case; merge sort always makes fewer comparisons than quicksort, except in extremely rare cases, when they tie, where merge sort's worst case is found simultaneously with quicksort's best case. In terms of moves, merge sort's worst case complexity is O(n log n)—the same complexity as quicksort's best case, and merge sort's best case takes about half as many iterations as the worst case.^{[citation needed]}
Recursive implementations of merge sort make 2n − 1 method calls in the worst case, compared to quicksort's n, thus merge sort has roughly twice as much recursive overhead as quicksort. However, iterative, nonrecursive, implementations of merge sort, avoiding method call overhead, are not difficult to code. Merge sort's most common implementation does not sort in place; therefore, the memory size of the input must be allocated for the sorted output to be stored in (see below for versions that need only n/2 extra spaces).
Merge sort as described here also has an often overlooked, but practically important, bestcase property. If the input is already sorted, its complexity falls to O(n). Specifically, n1 comparisons and zero moves are performed, which is the same as for simply running through the input, checking if it is presorted.
Sorting inplace is possible (e.g., using lists rather than arrays) but is very complicated, and will offer little performance gains in practice, even if the algorithm runs in O(n log n) time.^{[2]} In these cases, algorithms like heapsort usually offer comparable speed, and are far less complex. Additionally, unlike the standard merge sort, inplace merge sort is not a stable sort. In the case of linked lists the algorithm does not use more space than that the already used by the list representation, but the O(log(k)) used for the recursion trace.
Merge sort is more efficient than quick sort for some types of lists if the data to be sorted can only be efficiently accessed sequentially, and is thus popular in languages such as Lisp, where sequentially accessed data structures are very common. Unlike some (efficient) implementations of quicksort, merge sort is a stable sort as long as the merge operation is implemented properly.
As can be seen from the procedure merge sort, there are some demerits. One complaint we might raise is its use of 2n locations; the additional n locations were needed because one couldn't reasonably merge two sorted sets in place. But despite the use of this space the algorithm must still work hard: The contents of m is first copied into left and right and later into the list result on each invocation of merge_sort (variable names according to the pseudocode above). An alternative to this copying is to associate a new field of information with each key (the elements in m are called keys). This field will be used to link the keys and any associated information together in a sorted list (a key and its related information is called a record). Then the merging of the sorted lists proceeds by changing the link values; no records need to be moved at all. A field which contains only a link will generally be smaller than an entire record so less space will also be used.
Another alternative for reducing the space overhead to n/2 is to maintain left and right as a combined structure, copy only the left part of m into temporary space, and to direct the merge routine to place the merged output into m. With this version it is better to allocate the temporary space outside the merge routine, so that only one allocation is needed. The excessive copying mentioned in the previous paragraph is also mitigated, since the last pair of lines before the return result statement (function merge in the pseudo code above) become superfluous.
Merge sort is so inherently sequential that it is practical to run it using slow tape drives as input and output devices. It requires very little memory, and the memory required does not depend on the number of data elements.
For the same reason it is also useful for sorting data on disk that is too large to fit entirely into primary memory. On tape drives that can run both backwards and forwards, merge passes can be run in both directions, avoiding rewind time.
If you have four tape drives, it works as follows:
For almostsorted data on tape, a bottomup "natural merge sort" variant of this algorithm is popular.
The bottomup "natural merge sort" merges whatever "chunks" of inorder records are already in the data. In the worst case (reversed data), "natural merge sort" performs the same as the above—it merges individual records into 2record chunks, then 2record chunks into 4record chunks, etc. In the best case (already mostlysorted data), "natural merge sort" merges large alreadysorted chunks into even larger chunks, hopefully finishing in fewer than log n passes.
In a simple pseudocode form, the "natural merge sort" algorithm could look something like this:
# Original data is on the input tape; the other tapes are blank function merge_sort(input_tape, output_tape, scratch_tape_C, scratch_tape_D) while any records remain on the input_tape while any records remain on the input_tape merge( input_tape, output_tape, scratch_tape_C) merge( input_tape, output_tape, scratch_tape_D) while any records remain on C or D merge( scratch_tape_C, scratch_tape_D, output_tape) merge( scratch_tape_C, scratch_tape_D, input_tape) # take the next sorted chunk from the input tapes, and merge into the single given output_tape. # tapes are scanned linearly. # tape[next] gives the record currently under the read head of that tape. # tape[current] gives the record previously under the read head of that tape. # (Generally both tape[current] and tape[previous] are buffered in RAM ...) function merge(left[], right[], output_tape[]) do if left[current] ≤ right[current] append left[current] to output_tape read next record from left tape else append right[current] to output_tape read next record from right tape while left[current] < left[next] and right[current] < right[next] if left[current] < left[next] append current_left_record to output_tape if right[current] < right[next] append current_right_record to output_tape return
Either form of merge sort can be generalized to any number of tapes.
On modern computers, locality of reference can be of paramount importance in software optimization, because multilevel memory hierarchies are used. Cacheaware versions of the merge sort algorithm, whose operations have been specifically chosen to minimize the movement of pages in and out of a machine's memory cache, have been proposed. For example, the tiled merge sort algorithm stops partitioning subarrays when subarrays of size S are reached, where S is the number of data items fitting into a single page in memory. Each of these subarrays is sorted with an inplace sorting algorithm, to discourage memory swaps, and normal merge sort is then completed in the standard recursive fashion. This algorithm has demonstrated better performance on machines that benefit from cache optimization. ^{[3]}
M. A. Kronrod suggested in 1969 an alternative version of merge sort that used constant additional space ^{[4]}. This algorithm was refined by Katajainen, Pasanen and Teuhola ^{[5]}.
Although heapsort has the same time bounds as merge sort, it requires only Θ(1) auxiliary space instead of merge sort's Θ(n), and is often faster in practical implementations. On typical modern architectures, efficient quicksort implementations generally outperform mergesort for sorting RAMbased arrays. On the other hand, merge sort is a stable sort, parallelizes better, and is more efficient at handling slowtoaccess sequential media. Merge sort is often the best choice for sorting a linked list: in this situation it is relatively easy to implement a merge sort in such a way that it requires only Θ(1) extra space, and the slow randomaccess performance of a linked list makes some other algorithms (such as quicksort) perform poorly, and others (such as heapsort) completely impossible.
As of Perl 5.8, merge sort is its default sorting algorithm (it was quicksort in previous versions of Perl). In Java, the Arrays.sort() methods use merge sort or a tuned quicksort depending on the datatypes and for implementation efficiency switch to insertion sort when fewer than seven array elements are being sorted.^{[6]} Python uses timsort, another tuned hybrid of merge sort and insertion sort.
Merge sort's merge operation is useful in online sorting, where the list to be sorted is received a piece at a time, instead of all at the beginning. In this application, we sort each new piece that is received using any sorting algorithm, and then merge it into our sorted list so far using the merge operation. However, this approach can be expensive in time and space if the received pieces are small compared to the sorted list — a better approach in this case is to store the list in a selfbalancing binary search tree and add elements to it as they are received.

