PC_19_Sorting.pdf

Parallel Computing Designing Parallel Algorithms BITS Pilani Dr. Gargi Alavani Prabhu CS & IS Department Pilani Campus Sorting Algorithms One of the most commonly used and well-studied kernels. Sorting can...

Parallel Computing Designing Parallel Algorithms BITS Pilani Dr. Gargi Alavani Prabhu CS & IS Department Pilani Campus Sorting Algorithms One of the most commonly used and well-studied kernels. Sorting can be internal or external Sorting can be comparison-based or noncomparison- based. The fundamental operation of comparison-based sorting is compare-exchange. The lower bound on any comparison-based sort of n numbers is Θ(nlog n). We focus here on comparison-based sorting algorithms. BITS Pilani, Pilani Campus Sorting: Basics What is a parallel sorted sequence? Where are the input and output lists stored? We assume that the input and output lists are distributed. The sorted list is partitioned with the property that each partitioned list is sorted and each element in processor Pi's list is less than that in Pj's list if i < j. BITS Pilani, Pilani Campus Sorting: Parallel Compare Exchange Operation A parallel compare-exchange operation. Processes Pi and Pj send their elements to each other. Process Pi keeps min{ai,aj}, and Pj keeps max{ai, aj}. BITS Pilani, Pilani Campus Sorting: Basics What is the parallel counterpart to a sequential comparator? If each processor has one element, the compare exchange operation stores the smaller element at the processor with smaller id. This can be done in ts + tw time. If we have more than one element per processor, we call this operation a compare split. Assume each of two processors have n/p elements. After the compare-split operation, the smaller n/p elements are at processor Pi and the larger n/p elements at Pj, where i < j. The time for a compare-split operation is (ts+ twn/p), assuming that the two partial lists were initially sorted. BITS Pilani, Pilani Campus Sorting: Parallel Compare Split Operation A compare-split operation. Each process sends its block of size n/p to the other process. Each process merges the received block with its own block and retains only the appropriate half of the merged block. In this example, process Pi retains the smaller elements and process Pi retains the larger elements. BITS Pilani, Pilani Campus Sorting Networks Networks of comparators designed specifically for sorting. A comparator is a device with two inputs x and y and two outputs x' and y'. For an increasing comparator, x' = min{x,y} and y' = min{x,y}; and vice-versa. We denote an increasing comparator by  and a decreasing comparator by Ө. The speed of the network is proportional to its depth. BITS Pilani, Pilani Campus Sorting Networks: Comparators A schematic representation of comparators: (a) an increasing comparator, and (b) a decreasing comparator. BITS Pilani, Pilani Campus Sorting Networks A typical sorting network. Every sorting network is made up of a series of columns, and each column contains a number of comparators connected in parallel. BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort A bitonic sorting network sorts n elements in Θ(log2n) time. A bitonic sequence has two tones - increasing and decreasing, or vice versa. Any cyclic rotation of such networks is also considered bitonic. 1,2,4,7,6,0 is a bitonic sequence, because it first increases and then decreases. 8,9,2,1,0,4 is another bitonic sequence, because it is a cyclic shift of 0,4,8,9,2,1. The kernel of the network is the rearrangement of a bitonic sequence into a sorted sequence. BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort Let s = a0,a1,…,an-1 be a bitonic sequence such that a0 ≤ a 1 ≤ ··· ≤ an/2-1 and an/2 ≥ an/2+1 ≥ ··· ≥ an-1. Consider the following subsequences of s: s1 = min{a0,an/2},min{a1,an/2+1},…,min{an/2-1,an-1} s2 = max{a0,an/2},max{a1,an/2+1},…,max{an/2-1,an-1} (1) Note that s1 and s2 are both bitonic and each element of s1 is less than every element in s2. We can apply the procedure recursively on s1 and s2 to get the sorted sequence. BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort How do we sort an unsorted sequence using a bitonic merge? We must first build a single bitonic sequence from the given sequence. A sequence of length 2 is a bitonic sequence. A bitonic sequence of length 4 can be built by sorting the first two elements using BM and next two, using ӨBM. This process can be repeated to generate larger bitonic sequences. BITS Pilani, Pilani Campus Bitonic Sort Example Sequence: 3, 7, 4, 8, 6, 2, 1, 5 Step 1: Consider each 2- consecutive element as a bitonic sequence and apply bitonic sort on each 2- pair element. In the next step, take 4-element bitonic sequences and so on. BITS Pilani, Pilani Campus Bitonic Sort Example Sequence: 3, 7, 4, 8, 6, 2, 1, 5 Step 1: Consider each 2- consecutive element as a bitonic sequence and apply bitonic sort on each 2- pair element. In the next step, take 4-element bitonic sequences and so on. BITS Pilani, Pilani Campus Bitonic Sort Example Step 2 Two 4 element bitonic sequences: A(3,7,8,4) and B(2,6,5,1) with comparator length as 2 BITS Pilani, Pilani Campus Bitonic Sort Algorithm Bitonic sequence is created. Comparison between the corresponding element of the bitonic sequence. Swapping the second element of the sequence. Swapping the adjacent element. BITS Pilani, Pilani Campus Bitonic Sorting Solution BITS Pilani, Pilani Campus Try Example Sequence: 35,75,45,85,65,25,15,55 BITS Pilani, Pilani Campus Try Example Sequence: 35,75,45,85,65,25,15,55 BITS Pilani, Pilani Campus Bitonic Sorting BITS Pilani, Pilani Campus Bitonic Sorting BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort Merging a 16-element bitonic sequence through a series of log 16 bitonic splits. BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort We can easily build a sorting network to implement this bitonic merge algorithm. Such a network is called a bitonic merging network. The network contains log n columns. Each column contains n/2 comparators and performs one step of the bitonic merge. We denote a bitonic merging network with n inputs by BM[n]. Replacing the  comparators by Ө comparators results in a decreasing output sequence; such a network is denoted by ӨBM[n]. BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort A bitonic merging network for n = 16. The input wires are numbered 0,1,…, n - 1, and the binary representation of these numbers is shown. Each column of comparators is drawn separately; the entire figure represents a BM bitonic merging network. The network takes a bitonic sequence and outputs it in sorted order. BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort A schematic representation of a network that converts an input sequence into a bitonic sequence. In this example, BM[k] and ӨBM[k] denote bitonic merging networks of input size k that use  and Ө comparators, respectively. The last merging network (BM) sorts the input. In this example, n = 16. BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort The comparator network that transforms an input sequence of 16 unordered numbers into a bitonic sequence. BITS Pilani, Pilani Campus Sorting Networks: Bitonic Sort The depth of the network is Θ(log2 n). Each stage of the network contains n/2 comparators. A serial implementation of the network would have complexity Θ(nlog2 n). BITS Pilani, Pilani Campus Mapping Bitonic Sort to Hypercubes Consider the case of one item per processor. The question becomes one of how the wires in the bitonic network should be mapped to the hypercube interconnect. Note from our earlier examples that the compare- exchange operation is performed between two wires only if their labels differ in exactly one bit! This implies a direct mapping of wires to processors. All communication is nearest neighbor! BITS Pilani, Pilani Campus Mapping Bitonic Sort to Hypercubes Communication during the last stage of bitonic sort. Each wire is mapped to a hypercube process; each connection represents a compare-exchange between processes. BITS Pilani, Pilani Campus Mapping Bitonic Sort to Hypercubes Communication characteristics of bitonic sort on a hypercube. During each stage of the algorithm, processes communicate along the dimensions shown. BITS Pilani, Pilani Campus Mapping Bitonic Sort to Hypercubes Parallel formulation of bitonic sort on a hypercube with n = 2d processes. BITS Pilani, Pilani Campus Mapping Bitonic Sort to Hypercubes During each step of the algorithm, every process performs a compare-exchange operation (single nearest neighbor communication of one word). Since each step takes Θ(1) time, the parallel time is Tp = Θ(log2n) (2) This algorithm is cost optimal w.r.t. its serial counterpart, but not w.r.t. the best sorting algorithm. BITS Pilani, Pilani Campus Mapping Bitonic Sort to Meshes The connectivity of a mesh is lower than that of a hypercube, so we must expect some overhead in this mapping. Consider the row-major shuffled mapping of wires to processors. BITS Pilani, Pilani Campus Mapping Bitonic Sort to Meshes Different ways of mapping the input wires of the bitonic sorting network to a mesh of processes: (a) row-major mapping, (b) row-major snakelike mapping, and (c) row- major shuffled mapping. BITS Pilani, Pilani Campus Mapping Bitonic Sort to Meshes The last stage of the bitonic sort algorithm for n = 16 on a mesh, using the row-major shuffled mapping. During each step, process pairs compare-exchange their elements. Arrows indicate the pairs of processes that perform compare-exchange operations. BITS Pilani, Pilani Campus Mapping Bitonic Sort to Meshes In the row-major shuffled mapping, wires that differ at the ith least-significant bit are mapped onto mesh processes that are 2(i-1)/2 communication links away. The total amount of communication performed by each process is   2   7 n , or ( n ). The total computation ( j −1) / 2 log n i i =1 j =1 performed by each process is Θ(log2n). The parallel runtime is: This is not cost optimal. BITS Pilani, Pilani Campus Block of Elements Per Processor Each process is assigned a block of n/p elements. The first step is a local sort of the local block. Each subsequent compare-exchange operation is replaced by a compare-split operation. We can effectively view the bitonic network as having (1 + log p)(log p)/2 steps. BITS Pilani, Pilani Campus Block of Elements Per Processor: Hypercube Initially the processes sort their n/p elements (using merge sort) in time Θ((n/p)log(n/p)) and then perform Θ(log2p) compare-split steps. The parallel run time of this formulation is Comparing to an optimal sort, the algorithm can efficiently use up to p = (2 logn ) processes. The isoefficiency function due to both communication and extra work is Θ(plog plog2p). BITS Pilani, Pilani Campus Block of Elements Per Processor: Mesh The parallel runtime in this case is given by: This formulation can efficiently use up to p = Θ(log2n) processes. The isoefficiency function is BITS Pilani, Pilani Campus Performance of Parallel Bitonic Sort The performance of parallel formulations of bitonic sort for n elements on p processes. BITS Pilani, Pilani Campus Bubble Sort and its Variants The sequential bubble sort algorithm compares and exchanges adjacent elements in the sequence to be sorted: Sequential bubble sort algorithm. BITS Pilani, Pilani Campus Bubble Sort and its Variants The complexity of bubble sort is Θ(n2). Bubble sort is difficult to parallelize since the algorithm has no concurrency. A simple variant, though, uncovers the concurrency. BITS Pilani, Pilani Campus Odd-Even Transposition Sequential odd-even transposition sort algorithm. BITS Pilani, Pilani Campus Odd-Even Transposition Sorting n = 8 elements, using the odd-even transposition sort algorithm. During each phase, n = 8 elements are compared. BITS Pilani, Pilani Campus Odd-Even Transposition After n phases of odd-even exchanges, the sequence is sorted. Each phase of the algorithm (either odd or even) requires Θ(n) comparisons. Serial complexity is Θ(n2). BITS Pilani, Pilani Campus Parallel Odd-Even Transposition Consider the one item per processor case. There are n iterations, in each iteration, each processor does one compare-exchange. The parallel run time of this formulation is Θ(n). This is cost optimal with respect to the base serial algorithm but not the optimal one. BITS Pilani, Pilani Campus Parallel Odd-Even Transposition Parallel formulation of odd-even transposition. BITS Pilani, Pilani Campus Parallel Odd-Even Transposition Consider a block of n/p elements per processor. The first step is a local sort. In each subsequent step, the compare exchange operation is replaced by the compare split operation. The parallel run time of the formulation is BITS Pilani, Pilani Campus Parallel Odd-Even Transposition The parallel formulation is cost-optimal for p = O(log n). The isoefficiency function of this parallel formulation is Θ(p2p). BITS Pilani, Pilani Campus  BITS Pilani Pilani Campus Thank You