De Bruijn Superwalk with Multiplicities Problem is NPhard
 Evgeny Kapun^{1} and
 Fedor Tsarev^{1}Email author
https://doi.org/10.1186/1471210514S5S7
© Kapun and Tsarev; licensee BioMed Central Ltd. 2013
Published: 10 April 2013
Abstract
De Bruijn Superwalk with Multiplicities Problem is the problem of finding a walk in the de Bruijn graph containing several walks as subwalks and passing through each edge the exactly predefined number of times (equal to the multiplicity of this edge). This problem has been stated in the talk by Paul Medvedev and Michael Brudno on the first RECOMB Satellite Conference on Open Problems in Algorithmic Biology in August 2012. In this paper we show that this problem is NPhard. Combined with results of previous works it means that all known models for genome assembly are NPhard.
Introduction
The majority of current genome sequencing technologies are based on the shotgun method  the genome is split into several small fragments which are read directly. The problem of reconstructing the initial genome from these small fragments (reads) is known as the genome assembly problem. It is one of the fundamental problems of bioinformatics. Several models for genome assembly were studied by researchers. If reads are assumed to be errorfree, the assumption made in all models is that every read from the input must be a substring of the genome.
One of the models is based on maximum parsimony principle  the original genome should be the shortest string containing all reads as substrings. This leads to the Shortest Common Superstring (SCS) problem which is NPhard [1]. Modeling genome assembly as the SCS problem has a sufficient drawback: the majority of genomes have repeats  multiple similar (or even equal) fragments, while the SCS solution would underrepresent these repeats.
The de Bruijn graph model proposed in [2] deals with repeats much better. It is based on generating a set of all (k + 1)character substrings (called (k + 1)mers) of reads and constructing a de Bruijn graph in which the vertices are kmers and edges are (k + 1)mers. Each read is represented by a walk in this graph. Any walk containing all the reads as subwalks represents a valid assembly. Consequently, the genome assembly problem is formulated as finding the shortest superwalk, which is closely related to the polynomial time Eulerian tour problem (which was previously used to solve the problem of sequencing by hybridization [3]). Despite that, the Shortest De Bruijn Superwalk problem (SDBS) was shown to be NPhard [4]. Note also that SDBS has a special case solvable in polynomial time  if each subwalk contains only one edge, this problem can be reduced to Chinese Postman Problem [5].
In [6] an algorithm for reads' copy counts estimation based on maximum likelihood principle was proposed. A similar algorithm can be applied to find multiplicities of edges in the de Bruijn graph, so, the following problem was formulated in the talk [7]. Given a de Bruijn graph with vertices of size k constructed from a set of reads and multiplicities (in unary notation) of all edges of this graph find a superwalk consistent with edge multiplicities and containing all reads as subwalks. This problem is named De Bruijn Superwalk with Multiplicities problem (DBSM) and its computational complexity remained unknown.
In this paper we prove that this problem is NPhard.
NPhardness proof
The proof has the following structure. First, the Common Superstring with Multiplicities (CSM) problem is formulated. This problem is shown to be NPhard by reducing SCS to it. Then CSM is reduced to de Bruijn Superwalk with Multiplicities problem.

all strings S_{1}, S_{2}, ..., S_{ n } are substrings of S,

L_{ c } (S) = l_{ c } for each c ∈ ∑.
Theorem 1. Common Superstring with Multiplicities problem is NPhard for ∑ = 2.
Proof. To prove this, we take an instance of Shortest Common Superstring problem with ∑ = {0, 1}, which is NPhard [8], and transform it into an instance of Common Superstring with Multiplicities problem with the same answer. Let the original instance of SCS problem be $\left\{{S}_{1}^{\prime},{S}_{2}^{\prime},...,{S}_{n}^{\prime}\right\}$, l' (this instance means that we need to find if there exists a superstring of ${S}_{1}^{\prime},{S}_{2}^{\prime},...,{S}_{n}^{\prime}$ having length at most l').
Let us define T_{0} = 000111 and T_{1} = 001011. These strings have been selected in such a way that each of them contains the same number of zeroes and ones and they do not overlap  no proper suffix of any of the T_{ c }(c ∈ {0, 1}) is equal to any of the proper prefixes of any of the T_{ c }(c ∈ {0, 1}).
Then, let ${S}_{k}=T\left({S}_{k}^{\prime}\right)$ and l_{0} = l_{1} = 3l', where $T\left({c}_{1}{c}_{2}\phantom{\rule{0.3em}{0ex}}\phantom{\rule{0.3em}{0ex}}\dots \phantom{\rule{0.3em}{0ex}}\phantom{\rule{0.3em}{0ex}}{c}_{k}\right)={T}_{{c}_{1}}{T}_{{c}_{2}}\phantom{\rule{0.3em}{0ex}}\phantom{\rule{0.3em}{0ex}}\dots \phantom{\rule{0.3em}{0ex}}\phantom{\rule{0.3em}{0ex}}{T}_{{c}_{k}}$. The following lemmas formulate several properties of these instances of SCS and CSM problems. Equivalence of these instances is shown in lemmas 3 and 7.
Lemma 1. L_{0}(T(S')) = L_{1}(T(S')) = 3S'.
Proof. It follows directly from the definition of T.
Lemma 2. If ${S}_{1}^{\prime}$ is a substring of ${S}_{2}^{\prime}$, then $T\left({S}_{1}^{\prime}\right)$ is a substring of $T\left({S}_{2}^{\prime}\right)$.
Proof. It follows directly from the definition of T.
Lemma 3. If the answer for the original instance of SCS problem is positive, then the answer for the instance of CSM problem is also positive.
Proof. If the answer for the instance of SCS problem is positive, then there exists a string S' of length l'' ≤ l' such that S' is a superstring of ${S}_{1}^{\prime},{S}_{2}^{\prime},\dots ,{S}_{n}^{\prime}$. Then, let S = T(S'0^{l'l''}). Because S'0^{l'l''} = S' + 0^{l'l''} = l'' + (l'l'') = l', L_{0}(S) = L_{1}(S) = 3l' (see lemma 1) and all S_{ i }are substrings of T(S') (see lemma 2) the answer to the instance of CSM is indeed positive.

the length of that suffix is a multiple of 6,

if the length of the suffix is 6k, then the suffix of length k of ${S}_{1}^{\prime}$ is equal to the prefix of length k of ${S}_{2}^{\prime}$.
Proof. Suppose that the length of the suffix is equal to 6k + i, 0 < i < 6. Let c_{1} be the last character of ${S}_{1}^{\prime}$ and c_{2} be the character at the (k + 1)th position of ${S}_{2}^{\prime}$ (positions are numbered starting from one). Then, the suffix of ${T}_{{c}_{1}}$ of length i would be equal to the prefix of ${T}_{{c}_{2}}$ of the same length.
As mentioned before, no proper suffix of any of the T_{ c }(c ∈ {0, 1}) is equal to any of the proper prefixes of any of the T_{ c }(c ∈ {0, 1}). Therefore, the length of the suffix is a multiple of 6. The second follows from T_{0} and T_{1} both having length 6 and T_{0} ≠ T_{1}.
Lemma 5. Let ${S}_{1}^{\prime}$ and ${S}_{2}^{\prime}$ be two strings such that $T\left({S}_{1}^{\prime}\right)$ is a substring of $T\left({S}_{2}^{\prime}\right)$.

each occurrence of $T\left({S}_{1}^{\prime}\right)$ in $T\left({S}_{2}^{\prime}\right)$ starts at a position which is congruent to 1 modulo 6,

if $T\left({S}_{1}^{\prime}\right)$ occurs at position 6k + 1 in $T\left({S}_{2}^{\prime}\right)$, then ${S}_{1}^{\prime}$ occurs as a substring of ${S}_{2}^{\prime}$ at position k+ 1.
Proof. The proof is analogous to lemma 4.

i_{1}, i_{2}, ..., i_{ n } are all congruent to 1 modulo 6,

length of S is a multiple of 6,

There exists a string S' such that S = T(S'). Strings ${S}_{1}^{\prime},{S}_{2}^{\prime},...,{S}_{n}^{\prime}$ occur in S' at positions ${i}_{1}^{\prime},{i}_{2}^{\prime},...,{i}_{n}^{\prime}$,where ${i}_{k}=6{i}_{k}^{\prime}5$ for k= 1, 2, ..., n.
Proof. Suppose the contrary. Let i_{ k }be the smallest of i_{1}, i_{2}, ..., i_{ n }which is not congruent to 1 modulo 6. Then, if i_{ k }th character of S is covered by some $T\left({S}_{{k}^{\prime}}^{\prime}\right)$ such that i_{k'} <i_{ k }, we have a contradiction because i_{k'}is not congruent with i_{ k } modulo 6, but either $T\left({S}_{k}^{\prime}\right)$ and $T\left({S}_{{k}^{\prime}}^{\prime}\right)$ overlap, or $T\left({S}_{k}^{\prime}\right)$ is a substring of $T\left({S}_{{k}^{\prime}}^{\prime}\right)$, which would violate either lemma 4 or lemma 5. If i_{ k }th character of S is not covered by any $T\left({S}_{{k}^{\prime}}^{\prime}\right)$, such that, i_{k'} <i_{ k }, than (i_{ k } 1)th character of S must be covered by the last character of some $T\left({S}_{{k}^{\prime}}^{\prime}\right)$. But length of $T\left({S}_{{k}^{\prime}}^{\prime}\right)$ is a multiple of 6, so i_{ k }must be congruent to i_{k'}modulo 6, which leads to a contradiction.
The last character of S is also covered by the last character of some $T\left({S}_{k}^{\prime}\right)$. Because i_{ k }is congruent to 1 modulo 6 and the length of $T\left({S}_{k}^{\prime}\right)$ is a multiple of 6, the length of S is also a multiple of 6.
To prove the last point, it is enough to notice that for j = 1, 7, ..., S  5, the substring of S starting at position j and having length 6 is either T_{0} or T_{1}. This follows from the fact that the jth character of S is covered by an occurrence of $T\left({S}_{k}^{\prime}\right)$ for some k, but restrictions on lengths of $T\left({S}_{k}^{\prime}\right)$ and on i_{ k }mean that the whole substring of length 6 would be covered by $T\left({S}_{k}^{\prime}\right)$. Moreover, the position at which the substring of length 6 occurs in $T\left({S}_{k}^{\prime}\right)$ is congruent to 1 modulo 6, therefore that substring is either T_{0} or T_{1} by definition of T .
Lemma 7. If the answer for the instance of CSM problem is positive, then the answer for the original instance of SCS problem is also positive.
Proof. If the answer for the instance of CSM problem is positive, then there exists a string S of length 6l' which is a superstring of S_{1}, S_{2}, ..., S_{ n }. Let S'' be the shortest common superstring of these strings. Then S'' ≤ 6l' and each character of S'' is covered by an occurrence of one of S_{1}, S_{2}, ...,S_{ n }. Recall that ${S}_{k}=T\left({S}_{k}^{\prime}\right)$. By lemma 6, there exists a string S' such that S'' = T(S') and ${S}_{1}^{\prime},{S}_{2}^{\prime},...,{S}_{n}^{\prime}$ are substrings of S'. Also the equation $\left{S}^{\prime}\right=\frac{\left{S}^{\u2033}\right}{6}\le \frac{6{l}^{\prime}}{6}={l}^{\prime}$ holds. Therefore, the answer for the original instance of SCS problem is also positive.
Theorem 2. The de Bruijn Superwalk with Multiplicities Problem is NPhard for any fixed ∑ ≥ 2 and any positive integer k.

each S_{ k } is directly translated into a walk, by representing 0 as occurrence of edge 0 and 1 as occurrence of edge 1 in the walk,

the multiplicity of edge 0 is set to l_{0}, and the multiplicity of edge 1 is set to l_{1}.
To complete the proof we need to embed this graph into a de Bruijn graph with given k.
Conclusion
We have proved that the de Bruijn Superwalk with Multiplicities Problem is NPhard. Results of this work combined with [4] show that all known models for genome assembly are NPhard.
However, both de Bruijn Shortest Superwalk and de Bruijn Superwalk with Multiplicities problems have a special case (if subwalks consist of one edge) solvable in polynomial time. A reasonable direction for future research is to find if there exist other polynomially solvable special cases of these problems.
Declarations
Acknowledgements
Research was supported by the Ministry of Education and Science of Russian Federation in the framework of the federal program "Scientific and scientificpedagogical personnel of innovative Russia in 20092013" (contract 16.740.11.0495, agreement 14.B37.21.0562).
Declarations
Publication of this article was supported by the Ministry of Education and Science of Russian Federation in the framework of the federal program "Scientific and scientificpedagogical personnel of innovative Russia in 20092013" and by the University ITMO.
This article has been published as part of BMC Bioinformatics Volume 14 Supplement 5, 2013: Proceedings of the Third Annual RECOMB Satellite Workshop on Massively Parallel Sequencing (RECOMBseq 2013). The full contents of the supplement are available online at http://www.biomedcentral.com/bmcbioinformatics/supplements/14/S5.
Authors’ Affiliations
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