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1 Two Different Approximate String Matching Problems and Their Algorithms Speakers: C. W. Lu and Y. K. Shie Advisor: Richard Chia-Tung Lee

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2 Two different definitions of approximate string matching problem: –Given a text, a pattern and a error bound k, find all the substrings of T whose edit distances with P are less than or equal to k. (Denoted as Problem 1) –Given a text, a pattern and a error bound k, find all positions i of T such that there exists a suffix of T(1, i) whose edit distances with P are less than or equal to k. (Denoted as Problem 2)

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3 An example of Problem 1: T: a b a b c d b c d d P: abcd k = 1 Output: T(2, 6)=babcdT(4, 6)=bcd T(3, 6)=abcd T(6, 9)=dbcd T(3, 7)=abcdb T(7, 9)=bcd 12345678910

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4 An example of Problem 2: T: a b a b c d b c d d P: abcd k = 1 Output: Positions of T: 6, 7 and 9. 12345678910

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5 Computing the edit distance between two strings X and Y by using dynamic programming method: (Delete) (Insert) (Substitute) Let us denote this method to be DP1.

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6 i012345678 j Yaccgatgc 0 X012345678 1 a101234567 2 a211233456 3 a322233456 4 c432234455 5 g543323445 6 a654432345 Example: We can find the edit distances between all prefixes of Y and all prefixes of X from this table.

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7 Problem 1 can be solved by computing the edit distance between T(i, i+m-1+k) and P for all 0<i<n, and the time complexity is O(m 2 n). (m=size of P and n=size of T) That is, for every i, we perform DP1 on T(i, i+m-1+k) and P, for i=1 to n. Thus, we open a window with size m+k all the time and slide the window.

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8 T: a b a b c d b c P: a b c d k = 1 12345678 m+k i012345 j ababc 0 P012345 1 a101234 2 b210123 3 c321122 4 d432223 Output: ψ

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9 T: a b a b c d b c P: a b c d k = 1 12345678 m+k i012345 j babcd 0 P012345 1 a111234 2 b212123 3 c322212 4 d433321 Output: T(2, 6)=babcd

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10 T: a b a b c d b c P: a b c d k = 1 12345678 m+k i012345 j abcdb 0 P012345 1 a101234 2 b210123 3 c321012 4 d432101 Output: T(3, 5)=abc T(3, 6)=abcd T(3, 7)=abcdb

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11 T: a b a b c d b c P: a b c d k = 1 12345678 m+k i012345 j bcdbc 0 P012345 1 a112345 2 b212334 3 c321233 4 d432123 Output: T(4, 6)=bcd

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12 T: a b a b c d b c P: a b c d k = 1 12345678 m+k i01234 j cdbc 0 P01234 1 a11234 2 b22223 3 c32332 4 d43234 Output: ψ

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13 T: a b a b c d b c P: a b c d k = 1 12345678 m+k i0123 j dbc 0 P0123 1 a1123 2 b2212 3 c3321 4 d4332 Output: ψ

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14 Some algorithms try to avoid exhaustive computing in this way. For example, Navarro and Baeza-Yates Algorithm [NB2000], Fredriksson and Navarro Algorithm [FN2004], Lu and Lee Algorithm [LL2008]. We shall explain those algorithm later.

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15 Another approach which does not use this sliding window approach is the Wu and Manber Algorithm [WM92]. Actually, in [WM92], the idea proposed in [NB2000] was mentioned, but barely, as if this is trivial.

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16 To solve Problem 2, we may use another DP algorithm, called DP2, which will be explained as follows.

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17 Given strings Y and X, computing the minimal ED(S, X) where S is a suffix of the substring Y(1, i) for all 0<i<|Y|: Let us denote this method to be DP2. Note that SE[i. 0]=i in DP1 and SE[i, 0]=0 in DP2.

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18 i012345678 j Yaccgatgc 0 X000000000 1 a101110111 2 a211221122 3 a322232223 4 c432233332 5 g543323433 6 a654432344 Example:

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19 i012345678 j Yaccgatgc 0 X000000000 1 a101110111 2 a211221122 3 a322232223 4 c432233332 5 g543323433 6 a654432344 Table (5,6)=2 indicates that there is a substring, namely accga, ending at Location 5 of Y, whose edit distance with P is the smallest, among all substrings of T ending at location 5.

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20 i012345678 j Yaccgatgc 0 X000000000 1 a101110111 2 a211221122 3 a322232223 4 c432233332 5 g543323433 6 a654432344 Example: We need to trace back if we want to know which substring of Y is our solution.

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21 i012345678 j Yaccgatgc 0 X000000000 1 a101110111 2 a211221122 3 a322232223 4 c432233332 5 g543323433 6 a654432344 If we set k=3, then from the above table, we can see that locations 4,5,6 are the solutions for Problem 2. If k=4, the solutions are 2~8.

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22 Obviously, Problem 2 can be solved by DP2, and the time complexity is O(mn). It is to be noted that we do not use any window sliding method if DP2 is used directly. Again, if some of the positions of T could be ignored, this method would be more efficient. Some Algorithms try to do this. For example, Navarro and Baeza-Yates Algorithm [NB99], Tarhio and Ukkonen Algorithm [TU93] and Z. H. Pans thesis. We shall explain them later.

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23 HN Algorithm ( Bit-parallel Witnesses and their Applications to Approximate String Matching, Heikki Hyyro and Gonzalo Navarro, Algorithmica, 2005 Vol 4, No 3. ) For a substring S of T, they use the DP2 method to find the minimum ED(S, P) among all substring P of P. HN Algorithm solves Problem 1. But, they also use the DP2 method. We will explain in the next slide.

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24 For a window of size m-k, if there exists a substring S in this window such that its edit distance with every substring of P is greater than k, we move P to S. This rule is called Rule 5 by Lees group. S T:T: P:P: m - k HN Algorithm (This paper has not been reported yet. It is rumored Mr. Ou-Dee should study and report this. Obviously, he is busily doing some crazy things.

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25 abaeeaabcdeada 1234567891011121314 ababcd T P k=1 m-k dcbaba 0000000 e1111111 e2222222 a3 b4 a5 DP2: P >k ababcd P In this case, both patterns and texts are reversed.

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26 Both DP1 and DP2 can be improved by the LV algorithm, Fast Parallel and Serial Approximate String Matching, G. Landau and U. Vishkin, Journal of Algorithms, Vol.10 (1989), pp.157-169., which takes O(nk) time complexity. This algorithm tries not to do the entire computation of the DP table.

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27 Diagonal d is defined as all of the D i,j s where d = i–j,where D i,j is the value of (i, j) in DP table. Diagonal 2 Diagonal 0 1 0122c 101b 0000 cba i 1 2 3 j12j12

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28 This algorithm is based on the following observations: –The values of the elements on the same diagonal are non-decreasing. –The value of every element on the diagonal d is decided by the elements on diagonals d, d-1 and d+1. D i-1, j-1 D i, j-1 D i-1, j D i, j d d+1 d-1 delete insert substitution

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29 –The values of the elements on the same diagonal are non-decreasing. Proof: Assume these exists a value D i, j such that D i, j >D i+1, j+1. Then, we have D i, j D i+1, j+1 +1. By definition of DP, we have either D i+1, j+1 = D i+1, j + 1 or D i+1, j+1 = D i, j+1 + 1. That is, D i+1, j = D i+1, j+1 -1 or D i, j+1 = D i+1, j+1 -1. Thus, D i, j - D i+1, j 2 or D i, j - D i, j+1 2 The two cases all contradict to another property that the value of any location in the DP table can be only 1 larger than that of its neighbors.

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30 D i, j D i+1, j D i, j+1 D i+1, j+1 31 12

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31 Besides, the value of any location in the DP table can be only 1 larger than that of its neighbors. D i-1, j-1 D i, j-1 D i-1, j D i, j d d+1 d-1 delete insert substitution

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32 Let us consider the following table. Question: Assuming that we have already found all locations of i and j such that D i, j =0, what is largest j on diagonal 1 such that D i, j =1? j1234j1234 d =1 i 1 2 3 4 5 6 7 0c ?0t 00t 0000g 00000000 atctggg

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33 Let us consider the following table. Certainly D 4, 3 0 because we have found all 0s. D 4, 3 must be greater than 0 and can be only 1 larger than D 4, 2. Thus D 4, 3 =1. j1234j1234 d =1 i 1 2 3 4 5 6 7 0c ?0t 00t 0000g 00000000 atctggg

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34 Question: Can D(5,4)=1? –Since T 5 =P 4, D 5,4 =D 4,3 =1. j1234j1234 d =1 i 1 2 3 4 5 6 7 ?0c 10t 00t 0000g 00000000 atctggg This step can be found by a lowest common ancestor query which takes O(1) time [BF2000]. We explain it in next slide.

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35 1 0 a 0a 0a 10t 100t 0000g 00000000 ctctggg i 1 2 3 4 5 6 7 8 j12345j12345 d=3 Question: What is the longest common prefix of tac and taa? Answer: It is ta whose length is 2. This means that D 6, 3 and D 7, 4 are all 1. We find this longest common prefix by using a suffix tree.

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36 1 0 a 0a 0a 10t 100t 0000g 00000000 ctctggg i 1 2 3 4 5 6 7 8 j12345j12345 d=3 S1S1 S2S2 We concatenate the two strings gggtctac and gttaa and construct its suffix tree for finding the LCA of S 1 and S 2. S 1 =taa S 2 =tacgttaa

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37 S= gggtctacgttac S2S1 ta is found.

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38 Algorithms using the DP1 method to solve Problem 1.

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39 A Hybrid Indexing Method for Approximate String Matching Journal of Discrete Algorithms, No. 1, Vol. 1, 2000, pp. 205-239, Gonzalo Navarro and Ricardo Baeza-Yates Advisor: Prof. R. C. T. Lee Speaker: Y. K. Shieh

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40 Lemma 1 Let A and B are two strings such that ed(A,B) k. Let, for any j 1. Then at least one string appears in B with at most errors. By the above lemma, when j = k+1, we want to find whether any piece of P exactly appears in T or not. We divide P into several pieces. After the pattern is divided, it has a property as shown in the following Lemma 1.

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41 After we find all probable positions in T, we verify every substring of those positions. The probable positions of T are: 3, 10, 13, 15 and 16 We use DP1 with window size m+k to verify whether any approximate string matching occurs between T and P at the above locations. P 1 = CA P 2 = AG T P k = 1

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42 The algorithm would open windows whose sizes are all equal to m+k step by step. If a window does not contain any piece of P, that window is ignored. Thus it avoids an exhaustive search.

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43 The probable positions of T are 3, 10, 13, 15, 16 m+k GACAC 012345 C112234 A221223 A332223 G433333 k = 1 No approximate matching with k=1 found. T P i=1. Window size=m+k DP1 is used.

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44 m+k ACACG 012345 C111234 A212123 A322223 G433332 The probable positions of T are: 3, 10, 13, 15, 16 k = 1 No approximate matching with k=1 found. T P i=2. DP1 is used.

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45 m+k CACGG 012345 C101234 A210123 A321123 G432212 The probable positions of T are: 3, 10, 13, 15, 16 CACG is found. k = 1 T P i=3. DP1 is used.

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46 m+k The probable positions of T are: 3, 10, 13, 15, 16. k=1. This window does not include any probable position. Therefore we can ignore this window. T P i=4.

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47 m+k The probable positions of T are: 3, 10, 13, 15, 16. The window does not include any probable position. Therefore we can shift the window directly. T P i=5.

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48 m+k AAGCA 012345 C112334 A211233 A321233 G432123 The probable positions of T are: 3, 10, 13, 15, 16 k = 1. AAG is found. T P i=12. DP1 is used.

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49 Average-Optimal Multiple Approximate String Matching Kimmo Fredriksson, Gonzalo Navarro ACM Journal of Experimental Algorithmics, Vol 9, Article No. 1.4,2004, Pages 1-47 Professor R.C.T Lee Speaker K.W.Liu

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50 This algorithm uses a checking window. For a checking window of size m-k, if there exists a substring S in this window such that its edit distance with every substring of P is greater than k, we move P to S. We are using Rule 5 now. Our algorithm scans from the right as shown below: S T:T: P:P: m - k

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51 Note that the way to move the window ensures us that we do not miss anything and the size of the window needs only to be m+k. Besides, during the checking phase, the window size is m-k. But, how do we find such an S? We use a very useful lemma.

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52 Lemma Consider string Q and P. Let Q be divided into q 1,q 2,…,q n as shown below: qnqn …q2q2 q1q1 For each q i, let p i be the substring in P such that ED(q i,p i ) is the smallest, among all substrings in P.

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53 Divide a window of T into pieces as shown below T:T: P:P: …t2t2 t1t1 p1p1 p2p2

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54 To apply this lemma, we open a checking window in T with size m-k, according to Rule 5. We now divide this window into substrings with length 2, called 2- grams. Note that for 2-grams, the Hamming distance is equal to edit distance. T:T: P:P: …t2t2 t1t1 p1p1 p2p2 m-km-k

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55 Example T = ctagggaataatttacaatt P = ttaatatat k = 1 ctagggaataatttacaatt m-k Smallest edit distance between aa and all substrings of P = 0 Smallest edit distance between gg and all substrings of P = 2 > k already. According to Rule 5, we move P after S. S

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56 Example T = ctagggaataatttacaatt P = ttaatatat k = 1 ctagggaataatttacaatt m-k Smallest edit distance between tt and all substrings of P = 0 Smallest edit distance between aa and all substrings of P = 0 Smallest edit distance between at and all substrings of P = 0 Smallest edit distance between ga and all substrings of P = 1 == k ctagggaataatttacaatt m-k No S is found. We extend the window to size m+k and examine whether there is a prefix of the window whose edit distance with P is smaller than or equal to k by using DP1. S

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57 ctagggaataatttacaatt m-k m+k Example T = ctagggaataatttacaatt P = ttaatatat k = 1 No prefix of the extended window whose edit distance with P is smaller than or equal to k can be found. After checking, no matter whether a solution is found or not, we can only move P one step.

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58 Example T = ctagggaataatttacaatt P = ttaatatat k = 1 ctagggaataatttacaatt m-k ctagggaataatttacaatt

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59 An Approximate String Matching Algorithm Based upon the Candidate Elimination Method C. W. Lu Thesis

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60 T i x Example: T aaaacaacabacbaca aaaa 12345678910111213141516 17181920

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61 T i m-k m+k For every location i of T, we only consider the substrings. We use DP1 to decide whether any prefix of the window whose edit distance with P is smaller than or equal to k exists. The solution size must be between m-k and m+k. Therefore, any solution starting from i must end in the range of i+m-1-k and i+m-1+k. The window size is therefore m+k. Solution end points Window

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62 In the following, we shall show that we may determine that no solution can be found in a window.

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63 If N c ( ) = y, N c ( ) y, N c ( ) y, … and N c ( ) y. T aaaacaacabacbaca aaaa 12345678910111213141516 17181920 m-2 Example:m=9 and k = 2. N a (T(1, 7)) = 6, N b (T(1, 7)) = 0, N c (T(1, 7)) = 1. m-1 m m+1 m+2

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64 Let C 1 be the set of all alphabets c such that. If, then ED(, P) > k, for. Lemma 2. Thus, to use Lemma 2, we use a checking window whose size is m-k.

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65 Example T babbabbcabacbaca aaaa P accacabcb k = 2 12345678910111213141516 17181920 m-k N a (P) = 3, N b (P) = 2, N c (P) = 4. N a (T(1, 7)) = 2, N b (T(1, 7)) = 5, N c (T(1, 7)) = 0. The number of the character b in T(1, 7) is larger than that in P. N b (T(1, 7)) – N b (P) = 5 – 2 = 3 > k. Thus, the edit distances of all substrings starting at location 1 with P are larger than k.

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66 T aaaacaacabacbaca aaaa 12345678910111213141516 17181920 m-2 Example: N a (T(1, 11)) = 8, N b (T(1, 11)) = 1, N c (T(1, 11)) = 2. m-1 m m+1 m+2 If N c ( ) = y, N c ( ) y, N c ( ) y, …, N c ( ) y. m=9 and k = 2.

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67 Let C 2 be the set of all alphabets c such that. If, then ED(, P) > k, for. Lemma 3. To apply this lemma, the checking window size is now m+k.

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68 Example T aaaacaacabacbaca aaaa P accacabcb k = 2 12345678910111213141516 17181920 m+k N a (P) = 3, N b (P) = 2, N c (P) = 4. N a (T(1, 11)) = 8, N b (T(1, 11)) = 1, N c (T(1, 11)) = 2. The numbers of the characters b and c in T(1, 11) are smaller than in P. [N b (P) – N b (T(1, 11))] + [N c (P) – N c (T(1, 11))] = (2-1) + (4-2) = 3 > k. Thus, the edit distances of all substrings starting at location 1 with P are larger than k.

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69 If or, we can eliminate position i of T. That is, we prune all substrings, for out of consideration. Theorem 1.

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70 Example: T aaaacaacabacbaca aaaa P accacabcb k = 2 12345678910111213141516 17181920 m+k N a (P) = 3, N a (T(1, 7)) = 6, N a (T(1, 11)) = 8, N b (P) = 2, N b (T(1, 7)) = 0, N b (T(1, 11)) = 1, N c (P) = 4, N c (T(1, 7)) = 1, N c (T(1, 11)) = 2. m-k: N a (T(1, 7)) – N a (P) = 6-3 = 3 > k. m+k: [N b (P) – N b (T(1, 11))] + [N c (P) – N c (T(1, 11))] =(2-1) + (4-2) = 3 > k. m-k

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71 Example: T aaaacaacabacbaca aaaa P accacabcb k = 2 12345678910111213141516 17181920 m+k N a (P) = 3, N a (T(2, 8)) = 5, N a (T(2, 12)) = 7, N b (P) = 2, N b (T(2, 8)) = 0, N b (T(2, 12)) = 1, N c (P) = 4, N c (T(2, 8)) = 2, N c (T(2, 12)) = 3. m-k: N a (T(2, 8)) – N a (P) = 5-3 = 2 k. m+k: [N b (P) – N b (T(2, 12))] + [N c (P) – N c (T(2, 12))] =(2-1) + (4-3) = 2 k. m-k DP1 is to be used now.

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72 aaacaacabac 01234567891011 a1012345678910 c211223456789 c322223445678 a432232344567 c543323334566 a654332343456 b765443344345 c876544434444 b987655544455 T(2, 12) P > k k = 2 ED(, P) > k, DP1

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73 Example: T aaaacaacabacbaca aaaa P accacabcb k = 2 12345678910111213141516 17181920 m+k N a (P) = 3, N a (T(4, 10)) = 4, N a (T(4, 14)) = 6, N b (P) = 2, N b (T(4, 10)) = 1, N b (T(4, 14)) = 2, N c (P) = 4, N c (T(4, 10)) = 2, N c (T(4, 14)) = 3. m-k: N a (T(2, 8)) – N a (P) = 4-3 = 1 k. m+k: N c (P) – N c (T(2, 12)) = 4-3 = 1 k. m-k

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74 acaacabacba 01234567891011 a1012345678910 c210123456789 c321122345678 a432112234567 c543221234456 a654322123455 b765433212345 c876543322234 b987654433323 T(4, 14) P k k = 2 ED(, P) = 2 k. DP1

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75 Example: T aaaacaacabacbaca aaaa P accacabcb k = 2 12345678910111213141516 17181920 m+k m-k ED(T(4, 13), P) = 2 k.

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76 Algorithms using the DP2 method to Solve Problem 2.

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77 Very fast and simple approximate string matching Information Processing Letters, 72:65-70, 1999. G. Navarro and R. Baeza-Yates Advisor: Prof. R. C. T. Lee Speaker: H. M. Chen

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78 Lemma 1 Let A and B are two strings such that ed(A,B) k. Let, for any j 1. Then at least one string appears in B with at most errors. By the above lemma, when j = k+1, we want to find whether any piece of P exactly appears in T or not. Lemma 1 is used again. We divide P into several pieces. After the pattern is divided, it has a property as shown in the following Lemma 1.

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79 Suppose the window with size m exactly matches with P, we can extend it to the left to i-k and to the right to i+m-1+k. Thus, the approximate solution lies in the window with size m+2k. We now use DP2 to decide whether any substring in the window whose edit distance with P is smaller than or equal to k exists.

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80 Although this algorithm looks like the NB Algorithm [NB2000], it is actually different from it because we are now solving Problem 2 while NB Algorithm solves Problem 1. In the NB Algorithm, DP1 is used. The window size must be m+k and the window is moved step by step.

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81 But, in this algorithm, we solve Problem 2. Thus DP2 is used and the examination window size must be m+2k as shown below:

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82 A full example: T = GACACTAGCCACACTGATCC P = ACATCAGCC k = 1 By Lemma1, we divide P into j = k+1=1+1=2 pieces. Therefore, we obtain = ACATC, = AGCC.

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83 1 2 3 4 5 6 7 8 9 10 11 12 13 14 15 16 17 18 19 20 T = GACACTAGCCACACTGATCC P = ACATCAGCC We then open a window T(1, 1+m-1+2k)=T(1,11) and use DP2.

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84 GACACTAGCCA 000000000000 A110101101110 C221010111111 A332101112221 T443211122332 C554321223233 A665432223333 G766543332344 C877654443234 C988765554323 From the table, we conclude that there is no solution for k=1. DP2

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85 Pans Algorithm for Problem 2 In Pans thesis, he does not divide P into k+1 pieces. Instead, he picks k+1 substrings with constant length C. If for a window W, one such substring exactly appears, he then opens a window of size m+2k as shown below.

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86 Pans algorithm only checks those windows which are opened. The checking is done by DP2.

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87 Approximate Boyer-Moore String Matching Source : SIAM Journal on Computing, Vol. 22, No. 2, 1993, pp.243-260 J. Tarhio and E. Ukkonen Advisor: Prof. R. C. T. Lee Speaker: Kuei-hao Chen

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88 In the following figure, y in T is located at i and x in T is located in j. But, y does not appear within i-k to i+k in P and x does not appear within j-k to j+k. In this case, it can be seen that deleting any character in P will not result in an exact match. Thus, the edit distance between T and P must be larger than 1. Since k=1, it is impossible to have ED(T,P) k. k=1 i i+ki+k i-ki-k j

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89 Suppose a character x of a window of T is located in i. The range of P from i-k to i+k is called the 2k-range of x.

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90 In this algorithm, we always open a window with size m and check whether there exist k+1 characters in the window which do not appear in their corresponding 2k-ranges. If yes, shift the window according to some rules called The Shifting Rule explained later. If no, suppose the window starts at location i, use DP2 on a window T(i-k, i+m-1+k) of T with P. After this, shift the window according to the Shifting Rule.

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91 The Shifting Rule is given in the next slides.

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92 Case 1: There is one character in this (k+1)- suffix which exists in P in such a way as shown below. Move the pattern to match these characters. Note that in such a situation, there are at most k mismatches between the (k+1)-suffix and its corresponding substring in P. A x-suffix (prefix) is a suffix (prefix) with size x.

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93 A very tricky point here. An approximate solution of our problem may still start from a location to the left of i. In fact, it may start from any location between i-k to i+k. Similar argument applies to the ending point. Conclusion: The examination window size must be m+2k. i

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94 Case 2: No such a character exists. Move the pattern in such a way that the k-prefix of P aligns with the k-suffix of W as shown below. Under such a situation, again, there are at most k-mismatches between the k-suffix of W and k- prefix of P.

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95 We perform a pre-processing similar to the bad character rule pre-processing done in BM Algorithm. For this algorithm, the checking window size is m and the examination window size is m+2k.

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96 Complete example for approximate string matching For example : Let k=1, m=8, n=24 T:GCATCGCAGAGAGTATGCAGAGCG P:GCAGAGAG ΣA C G * D 1 [i=8, a]1 6 2 8 D 1 [i=7, a]2 5 1 8 Bad character rule Table.

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97 Example(1/15) 123456789101112131415161718192021222324 T:GCATCGCAGAGAGTATGCAGAGCG P:GCAGAGAG ΣA C G * D[i=8, a]1 6 2 8 D[i=7, a]2 5 1 8 k=1 >k>k t 8 =A appears in P(7,8) t 7 =C does not appear in P(6,8) t 6 =G appears in P(5,7) t 5 =C does not appear in P(4,6) Shifting is needed now. We examine the (k+1)-suffix which is a 2-suffix.

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98 Example(2/15) ΣA C G * D[i=8, a]1 6 2 8 D[i=7, a]2 5 1 8 123456789101112131415161718192021222324 T:GCATCGCAGAGAGTATGCAGAGCG P:GCAGAGAG >k>k k=1 t 9 =G appears in P(7,8) t 8 =A appears in P(6,8) t 7 =C does not appear in P(5,7) t 6 =G appears in P(4,6) t 5 =C does not appear in P(3,5) Shifting is needed now.

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99 Example(3/15) ΣA C G * D[i=8, a]1 6 2 8 D[i=7, a]2 5 1 8 123456789101112131415161718192021222324 T:GCATCGCAGAGAGTATGCAGAGCG P:GCAGAGAG >k>k k=1 t 11 =G appears in P(7,8) t 10 =A appears in P(6,8) t 9 =G appears in P (5,7) t 8 =A appears in P(4,6) t 7 =C does not appear in P(3,5) t 6 =G appears in P(2,4) t 5 =C appears in P(1,3) t 4 =T does not appear in P(1,2) Shifting is needed now.

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100 123456789101112131415161718192021222324 T:GCATCGCAGAGAGTATGCAGAGCG P:GCAGAGAG ΣA C G * D[i=8, a]1 6 2 8 D[i=7, a]2 5 1 8 Output locations 12, 13 and 14. CGCAGAGAGT G C A G A G A G 00000000000 11011010101 21101111111 32210112122 421011212 52101122 6210112 721012 82101 k=1 No k+1 characters in the window do not appear in their 2k-ranges. DP2 is used.

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101 Summary 1. DP1 is used for Problem 1 and DP2 is used for Problem 2. 2. For both problems, algorithms try to avoid exhaustive search. 3. Most algorithms use checking windows to determine which region needs to be examined. 4. The NB Algorithm in [NB99] and Pan Algorithm do not use checking windows to determine regions which need to be examined.

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102 5. During the examination phase when DP1 or DP2 is used, there is another window which may be called the examination window. 6. For Problem 1 where DP1 is used, the examination window size is m+k for all algorithms. 7. For Problem 2 where DP2 is used, the examination window size is m+2k for all algorithms.

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103 The examination window size is m+2k when the solution may start and end as shown below:

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104 Thank You

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1 Fast text searching: allowing errors Sun Wu and Udi Manber, Communications of the ACM, Vol. 35, 1992, pp. 83-91 Advisor: Prof. R. C. T. Lee Reporter:

1 Fast text searching: allowing errors Sun Wu and Udi Manber, Communications of the ACM, Vol. 35, 1992, pp. 83-91 Advisor: Prof. R. C. T. Lee Reporter:

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