Cooperative local repair in distributed storage
 Ankit Singh Rawat†^{1},
 Arya Mazumdar†^{2}Email author and
 Sriram Vishwanath^{1}
https://doi.org/10.1186/s1363401502920
© Rawat et al. 2015
Received: 3 July 2015
Accepted: 29 November 2015
Published: 23 December 2015
Abstract
Erasurecorrecting codes, which support local repair of codeword symbols, have attracted substantial attention recently for their application in distributed storage systems. This paper investigates a generalization of the usual locally repairable codes. In particular, this paper studies a class of codes with the following property: any small set of codeword symbols can be reconstructed (repaired) from a small number of other symbols. This is referred to as cooperative local repair. The main contribution of this paper is bounds on the tradeoff of the minimum distance and the dimension of such codes, as well as explicit constructions of families of codes that enable cooperative local repair. Some other results regarding cooperative local repair are also presented, including an analysis for the wellknown Hadamard/Simplex codes.
Keywords
Coding for distributed storage Locally repairable codes Codes on graphs Cooperative repairAMS subject classification
94B05 94B25 94B65 94B601 Introduction
In this paper, we explore a new class of codes that enable efficient recovery from the failure of multiple code symbols. In particular, we study codes with (r,ℓ)cooperative locality which allow for any ℓ failed code symbols to be recovered by contacting at most r other intact code symbols. Our study of such codes is motivated by their application in distributed storage systems a.k.a. cloud storage, where information is stored over a network of storage nodes (disks). In order to protect the stored information against inevitable node (disk) failures, a distributed storage system encodes the information using an erasurecorrecting code. The code symbols from the obtained codeword are then stored on the nodes in the system. Each node stores one code symbol from the codeword.
The task of recovering the code symbols stored on failed nodes with the help of the code symbols stored on intact nodes is referred to as code repair or node repair [1]. An erasurecorrecting code with an efficient code repair process helps quickly restore the state after node failures. This consequently enables seamless operation of the system for a long time period. Recently, multiple classes of erasurecorrecting codes have been proposed that optimize the code repair process with respect to various performance metrics. In particular, the codes that minimize repairbandwidth, i.e., the number of bits communicated during repair of a single node, are studied in [1–4] and references therein. The codes that enable small diskI/O during the repair process are studied in [3, 5]. Another family of erasure codes that focus on small locality, i.e., enabling repair of a single failed code symbol by contacting a small number of other code symbols, are presented in [6–11].
A code is said to have allsymbol locality r if every the code symbol is a function of at most r other code symbols. This ensures local repair of each code symbol by contacting at most r other code symbols. In this paper, we generalize the notion of codes with allsymbol locality to codes with (r,ℓ)cooperative locality: any set of ℓ code symbols are functions of at most r other code symbols. This allows for cooperative local repair of code symbols, where any group of ℓ failed code symbols is repaired by contacting at most r other code symbols.
The ability to perform code repairs involving more than one failure is a desirable feature in most of the distributed storage systems that can experience multiple simultaneous failures [12]. Moreover, this property also allows for deliberately delaying code repairs when system resources need to be freed to support other system objectives, e.g., queries (accesses), to the stored information by clients. Here, we note that the approach of cooperative code repair has been previously explored in the context of repairbandwidth efficient codes in [13, 14] and references therein.
In this paper, we address two important issues regarding codes with (r,ℓ)cooperative locality: (1) obtaining tradeoffs among minimum distance, dimension (rate), and locality parameters (r,ℓ) for such code and (2) presenting explicit constructions for codes with (r,ℓ)cooperative locality that are close to the obtained tradeoffs. Towards designing codes with (r,ℓ)cooperative locality, we mainly focus on codes with maximum possible rate. We construct a code with (r,ℓ)cooperative locality that has rate at least \(\frac {r  \ell }{r + \ell }\). This code construction is based on the regular bipartite graphs with girth at least ℓ+1. In the light of an upper bound \(\frac {r}{r + \ell }\) on the rate of a code with (r,ℓ)cooperative locality that we show later, this construction provides codes that are very close to being optimal. Here, we also note that there are explicit constructions for the regular bipartite graphs with large girth [15]. Thus, one can obtain high (almost optimal) rate codes with (r,ℓ)cooperative locality for distributed storage systems. Note that, a minimum distance is not guaranteed in this construction. We also show that the codes based on expander graphs enable cooperative local repairs while maintaining both high rate and good minimum distance.
Given a large number of parity constraints with low weights, expander graphbased codes are natural candidates for codes to enable locality. However, these codes are overkill when one is interested in code repair of single failed symbol and codes with significantly better rate vs. distance tradeoff can be obtained [6, 9, 11, 16]. But as we aim to recover from multiple failures in a local manner, these codes become an attractive option.
1.1 Contributions and organization
In Section 2, we first present a formal definition of codes with (r,ℓ)cooperative locality and highlight the connections between the notion of cooperative locality as defined in this paper and various other contemporary notions from distributed storage literature [9–11, 16–20] that aim to generalize locally repairable codes (LRCs) [6, 7]. In Section 2.1, we comment on the cooperative locality parameters of the codes with multiple smallsized disjoint repair groups for each code symbol [17]. In Section 2.2, we highlight both the differences and similarities between the codes with (r,ℓ)cooperative locality and the codes with \((\tilde {r}, \delta)\)locality [16].
In Section 3, we obtain an upper bound on the minimum distance of a code with (r,ℓ)cooperative locality which encodes k information symbols to n symbols long codewords. As a special case of this result, we then obtain a bound on the best possible rate for a code with (r,ℓ)cooperative locality with no further minimum distance requirement.
We address the issue of providing explicit constructions for codes with (r,ℓ)cooperative locality in Sections 4, 6.1 and 6.2.
Summary of the constructions of codes with (r,ℓ)cooperative locality considered in this paper. For the codes based on unbalanced bipartite expander graphs (Section 6.2.1), we assume that the underlying bipartite graphs is biregular with h and Δ representing its left and right degrees, respectively. Moreover, the graph exhibits expansions from left to right of any set of at most α n left nodes with expansion ratio h(1−ε). Here, the constituent local codes have distance at least t+1. For codes based on double cover of regular expander graphs (Section 6.2.2), Δ and λ denote the degree and the second largest absolute eigenvalue of the underlying graph, respectively. This construction utilizes smaller code of minimum distance at least δ Δ to define local constraints at the vertices of the double cover
Construction  Cooperative locality  Rate \(\text {rate}(\mathcal {C})\)  Minimum distance \(d_{\min }(\mathcal {C})\) 

Partition code (Section 4.1)  (r,ℓ)  \(\frac {r}{r + \ell ^{2}}\)  \(n  k + 1  \ell \left (\frac {k\ell }{r}  1\right)\) 
Product code (Section 4.2)  (r,ℓ)  \(\left (\frac {r}{r+1}\right)^{\ell }\)  ℓ+1 
Concatenated code (Section 5)  (r,ℓ)  \(\frac {\ell + 2}{\ell + 4}\frac {r}{r + 2}\)  ℓ+1 
Regular bipartite graphbased code (Section 6.1)  (r,ℓ)  \( \geq \frac {r  \ell }{r + \ell }\)  ≥ℓ+1 
Unbalanced bipartite expander graphbased code (Section 6.2.1)  (r,ℓ)  \(\geq 1 + \frac {h}{\Delta }\frac {r}{\ell }  h\)  \(\geq \left (2  \epsilon \frac {\epsilon }{t}\right)\alpha n\) 
Double cover of regular expander graph basedcode (Section 6.2.2)  (r,ℓ)  \(\geq 2\frac {r}{\ell \Delta }  1\)  \(\delta \left (\delta  \frac {\lambda }{\Delta }\right)n\) 
Hadamard code (Section 7)  (r=ℓ+1,ℓ), \(\forall 1\le \ell \le \frac {n1}2\)  \(\frac {\log (n+1)}{n}\)  \(\frac {n+1}2\) 
Certain families of classical algebraic codes may possess local repair property. In Section 7, we study punctured Hadamard codes (a.k.a. Simplex codes) in the context of cooperative local repair. We show that a punctured Hadamard code with n symbols long codewords has (r=ℓ+1,ℓ)cooperative locality for any \(\ell \leq \frac {n1}{2}\). We conclude this paper in Section 8 with some directions for future work.
A short note on notation: we use bold lowercase letters to denote vectors. For an integer n≥1, [n] denotes the set {1,2,…,n}. For a code \({\mathcal C}\), we use \(\text {rate}({\mathcal C})\) and \(d_{\min }({\mathcal C})\) to denote its rate and minimum distance, respectively.
1.2 Related work
The concept of codes with small locality for distributed storage system is introduced in [6, 8, 21]. In [6], Gopalan et al. study the rate vs. distance tradeoff for linear codes with small locality or locally repairable codes^{1}. The similar tradeoffs under more general definitions of locally repairable codes and constructions of the codes attaining these tradeoffs are studied in [7, 9–11, 16, 22, 23] and references therein.
In [24], Prakash et al. consider codes that allow for local repair of multiple code symbols. In particular, they focus on codes that can correct two erasures by utilizing two parity checks of weights at most r+1. Prakash et al. derive the rate vs. distance tradeoff for such code and (for largeenough field size) show the existence of the codes that attain the tradeoff. We note that the definition of cooperative locality considered in this paper is more general than that studied in [24]. Moreover, we do not restrict ourselves to only two erasures. In Section 6.1.2, we show that the codes based on regular bipartite graphs with high girth are ratewise (almost) optimal under the natural generalization of [24] to more than two erasures.
Recently, the codes that enable multiple ways to locally repair a code symbols have received attention. In [11, 17, 18], the codes that enable multiple disjoint repair groups for every code symbol are considered. The codes that provide multiple disjoint repair group for only information symbols are studied in [19, 20]. In Section 2.1, we comment on the implication of this line of work for the issue of cooperative locality.
2 Codes with (r,ℓ)cooperative locality
Definition 1.
 1.
\(\Gamma _{{\mathcal S}} \leq r\),
 2.
For any codeword \(\mathbf {c} = (c_{1}, c_{2},\ldots, c_{n}) \in {\mathcal C}\), the ℓ code symbols \(\mathbf {c}_{{\mathcal S}} := \{c_{i} : i \in {\mathcal S}\}\) are functions of the code symbols \(\mathbf {c}_{\Gamma _{{\mathcal S}}}:= \{c_{i} : i \in \Gamma _{{\mathcal S}}\}\).
Note that Definition 1 ensures that any ℓ code symbols can be cooperatively repaired from at most r other code symbols. This generalizes the notion of codes with allsymbol locality r [6–8], where locality is defined with respect to one code symbol, i.e., ℓ=1.
Remark 1.
The code attaining the bound in (1) are presented in [7, 9–11] and references therein.
2.1 Cooperative locality from codes with multiple disjoint local repair groups for code symbols
In [11, 17, 18], codes with multiple disjoint local repair groups for all code symbols are studied. These codes allow for multiple ways to recover a particular code symbol by contacting disjoint sets of small number of other code symbols. In particular, the work in [11, 17, 18] study codes with at least t disjoint local repair groups, each comprising of at most \(\tilde {r}\) other code symbols. We claim, according to our definition, these codes also have \((\tilde {r}i, \ell = i)\)cooperative locality for each i∈ [t]. Without loss of generality, we establish this for i=t, i.e., we argue that a code with t disjoint repairs groups (each of size at most \(\tilde {r}\)) has \((\tilde {r}t, \ell = t)\)cooperative locality.
Consider a set of t code symbols in failure. For any of these t failed code symbols, each symbol can have at least one failed code symbol in at most t−1 of its t disjoint repair groups. This implies that the code symbol under consideration has at least one of its local repair groups free of any failures. Thus, the code symbol can be repaired with the help of one of its intact local repair groups. This leave us with t−1 code symbols in failure (erasure). Now, for another code symbol in failure, we can have at most t−2 of its disjoint local repair groups with at least one failed code symbol. This leaves at least 2 of its disjoint local groups intact; therefore, this code symbol can be repaired with the help of one of its intact local repair groups. Following the similar argument, we can see that all of the t failed code symbols can be repaired in a code with t disjoint repair groups for all code symbols. In the worst case, we contact at most \(\tilde {r}t\) code symbols to repair all of the t failures. This establishes the \((\tilde {r}t, \ell = t)\)cooperative locality for the codes under consideration.
Similarly, the codes with availability [19, 20], which enable multiple disjoint repair groups only for information (systematic) symbols in a codeword, can allow for cooperative local repair for certain ranges of system parameters. In particular, ([20] Construction I can give codes with \((\tilde {r}\ell, \ell)\)cooperative locality and rate \(\frac {\tilde {r}}{\tilde {r} + \ell }\).
Remark 2.
Here, we would like to note that the definition of the codes with (r,ℓ)cooperative locality (Definition 1) is more general. In particular, we show in Sections 4.1, 5, and 6.1 that it is possible to have codes with (r,ℓ)cooperative locality that do not have at least t=ℓ disjoint local repair groups for all code symbols (or information symbols).
2.2 Comparison with the codes with \((\tilde {r}, \delta)\)locality [9, 10]
In [16], Prakash et al. propose to study codes with \((\tilde {r}, \delta)\)locality, a generalization that enforces additional requirements which the local repair groups of an LRC need to satisfy. In particular, a code \({\mathcal C}\) is said to have \((\tilde {r}, \delta)\)locality if there is a set of codes \(\{\mathcal {C}_{i}\}_{i \in {\mathcal L}}\) obtained by puncturing the code \({\mathcal C}\), for some index set \({\mathcal L}\), such that the following three requirements hold: (1) for each \(i \in {\mathcal L}\), the support of \(\mathcal {C}_{i}\) is no more than \(\tilde {r}+\delta 1\); (2) for each \(i \in {\mathcal L}\), the minimum distance of \({\mathcal C}_{i}\) is larger than or equal to δ; and (3) each code symbol is contained in the support of at least one of the punctured codes \(\mathcal {C}_{i}\), \(i \in {\mathcal L}\). The rate vs. distance tradeoffs for the codes with \((\tilde {r}, \delta)\)locality and the constructions attaining these tradeoffs are presented in [9, 10].
Note that a code with (r,δ)locality ensures repair of any δ−1 failures within each punctured code. Here, we would like to highlight that the notion of (r,ℓ)cooperative locality is different from that of (r,δ)locality. In particular, codes with (r,ℓ)cooperative locality are not required to meet the requirement (2) in the aforementioned definition of the codes with (r,δ)locality. As a result, there are families of codes which satisfy the requirements of (r,ℓ)cooperative locality but that do not meet the definition of the codes with (r,δ)locality. We illustrate this with the help of the following example.
We note that the code \({\mathcal C}\) is nothing but a [7,3,4] Simplex code which we study in Section 7. It follows from the analysis presented in Section 7 that this code has (r=3,ℓ=2)cooperative locality, i.e., any set of ℓ=2 failed code symbols can be recovered by contacting r=3 other code symbols. Let us assume that the code symbols a and a+b are in failure. In this case, we can recover both the failed code symbols from the set of r=3 code symbols (b,b + c,a + b + c). In other words, (a,a + b,b,b + c,a + b + c) form a punctured code of the original code \({\mathcal C}\) at r+ℓ=5 indices. However, this punctured code does not have minimum distance at least ℓ+1=δ=3. This can easily be observed from the fact that the punctured subcode does not allow the repair of two code symbols b + c and a + b + c from the remaining set of three code symbols (a,a + b,b). Moreover, there is no punctured codes of the original code at at most r+ℓ=5 indices which has minimum distance at least ℓ+1=3. Therefore, \({\mathcal C}\) is an example of a code with (r=3,ℓ=2)cooperative locality which does not have (r=3,δ=ℓ+1=3)locality as defined in [16].
This also shows that the definition of (r,ℓ)cooperative locality is not a strengthening of the definition of (r,δ)locality. Hence, one cannot directly invoke the impossibility results for the codes with (r,δ)locality to obtain impossibility results for the codes with (r,ℓ)cooperative locality. However, as far as the achievability is concerned, a construction for a code with \((\tilde {r}, \delta)\)locality gives a construction with \((r = \ell \tilde {r}, \ell = \delta  1)\)cooperative locality as explained in Section 4.
3 Rate vs. distance tradeoff for codes with (r,ℓ)cooperative locality
In this section, for given r and ℓ, we present a tradeoff between the rate and the minimum distance of a code with (r,ℓ)cooperative locality (cf. Definition 1). We employ the general proof technique introduced in [6, 22, 23] to obtain the following result.
Theorem 1.
Proof.
We refer the reader to Section 8.1 for the complete proof.
Remark 3.
Note that an (n,k) code with (r,ℓ)cooperative locality has its minimum distance at least ℓ+1 as it can recover from the erasure of any ℓ code symbols (cf. Definition 1). Combining this observation with Theorem 1, we obtain the following result.
Corollary 1.
Proof.
Remark 4.
Here, we note that the assumption r≥ℓ is a natural assumption as it always holds for linear codes with (r,ℓ)cooperative locality and dimension at least ℓ, i.e., k≥ℓ. Note that the additional term \(\frac {1}{n}\frac {\ell ^{2}}{r}\) that we have for the case when r<ℓ vanishes as n becomes large as compared to ℓ.
4 Naive constructions of codes with (r,ℓ)cooperative locality
In this section, we address the issue of constructing high rate codes that have (r,ℓ)cooperative locality. In particular, we describe two simple constructions that ensure cooperative local repair for the failure of any ℓ code symbols: (1) partition code and (2) product code. In partition code, we partition the information symbols in groups of \(\frac {r}{\ell }\) symbol and encode each group with an \(\left (\frac {r}{\ell } + \ell, \frac {r}{\ell }\right)\) maximum distance separable (MDS) code (cf. Section 4.1). On the other hand, a product code is obtained by arranging \(k = \left (\frac {r}{\ell }\right)^{\ell }\) information symbols in an ℓdimensional array and then introducing parity symbols along different dimensions of the array (cf. Section 4.2).
4.1 Partition code
 1.
Partition k information symbols into \(p = \frac {k\ell }{r}\) groups of size \(\frac {r}{\ell }\) each.
 2.
Encode the symbols in each of the p groups using an \(\left (\frac {r}{\ell } + \ell, \frac {r}{\ell }\right)\) MDS code over \(\mathbb {F}_{q}\). We refer to the \(\frac {r}{\ell } + \ell \) code symbols obtained by encoding \(\frac {r}{\ell }\) information symbols in the ith group as ith local group.
As it is clear from the construction, partition code has the rate \(\frac {k}{n} = \frac {r}{r + \ell ^{2}}\). Moreover, a code symbol can be recovered from any \(\frac {r}{\ell }\) other code symbols from its local group. In the worst case, when ℓ failed code symbols belong to ℓ distinct local groups, we can recover all ℓ symbols from \(\ell \frac {r}{\ell } = r\) code symbols, downloading \(\frac {r}{\ell }\) symbols from each of the ℓ local groups containing one failed code symbol.
Remark 5.
In the above construction of the partition codes, we use an \(\left (\frac {r}{\ell } + \ell, \frac {r}{\ell }\right)\) MDS code to encode disjoint groups of \(\frac {r}{\ell }\) message symbols. Note that the rate of this MDS code governs the rate of the overall code. One can potentially use some other code \({\mathcal C}^{\text {local}}\) of minimum distance at least ℓ+1 to encode disjoint groups of \(\frac {r}{\ell }\) message symbols. Now, we use r(x), x∈ [ ℓ] to denote the number of symbols that needs to be contacted to repair x erasure in one local group. For the case when an \(\left (\frac {r}{\ell } + \ell, \frac {r}{\ell }\right)\) MDS code is used, we have \(r(x) = \frac {r}{\ell }\) for x∈ [ ℓ]. Let r ^{∗}(x) denote the upper concave envelope of r(x) on the interval \([\!1, \ell ] \in \mathbb {R}\). Assume that we have p disjoint local groups, then a pattern of ℓ erasures can be represented by a vector (l _{1},l _{2},…,l _{ p }). Here, l _{ i } denotes the number of erasures within the ith local group. Note that we have \(\sum _{i = 1}^{p}l_{i} = \ell \).
Since the rate of the partition code is agnostic to the number of local groups, we can use the value of p which can support k message symbols and minimizes the R.H.S. of (11). This approach optimizes the value of r for a given choice of ℓ and \({\mathcal C}^{\text {local}}\).
Example 1.
It is possible to achieve better locality parameters in the partition code than just to use the copies of MDS codes. Consider a partition code with two blocks, each being a punctured Hadamard [7,3,4] code. From Theorem 4, we know that r(x)=r ^{∗}(x)=x+1, for 1≤x≤3 for these Hadamard codes. Hence, we have an (14,6) code with (5,3)cooperative locality.
On the other hand, consider a partition code with two blocks of (7,3) MDS codes. For this (14,6) code, we may need to access up to six symbols to repair even two symbols. Indeed, the overall code has (6,3)cooperative locality.
4.2 Product code
 1.
Arrange \(k = \left (\frac {r}{2}\right)^{2}\) information symbols in an \(\frac {r}{2} \times \frac {r}{2}\) array.
 2.
For each row of the array, add a parity symbol by summing all \(\frac {r}{2}\) symbols in the row and append these symbols to their respective rows.
 3.
For each of the \(\frac {r}{2} + 1\) columns of the updated array, add a parity by summing all \(\frac {r}{2}\) symbols in the column.
Remark 6.
An ℓdimensional product code enables ℓ disjoint repair groups for all code symbols. For example, every code symbol in a twodimensional product code has two disjoint repair groups, associated with its row and column, respectively. Therefore, cooperative locality of product codes follows from the discussion in Section 2.1. We note that product codes along with their minimum distance have been previously been considered in [11, 19] in the context of codes with small locality.
Here, we would like to note that the difference between the rate achieved by the partition code and the bound in (7) gets smaller as the parameter r becomes large as compared to the parameter ℓ. It is an interesting problem to either tighten the bound in (7) or present a construction for codes with (r,ℓ)cooperative locality which have higher rate than that of the partition code. In the next two sections, we present two approaches to achieve this goal.
5 Concatenated codes with (r,ℓ)cooperative locality
Before we describe the concatenated codes with (r,ℓ)cooperative locality for general ℓ, let us consider a few examples for small values of ℓ.
5.1 When ℓ=3
Let us take an \(\left [\frac {r}{3} + 1, \frac {r}{3}, 2\right ]\) MDS code over \(\mathbb {F}_{q}\) as the inner code. This code can repair any one failed code symbol by contacting the remaining \(\frac {r}{3}\) code symbols. For outer code, we employ a code with (r _{out},1)cooperative locality over \(\mathbb {F}_{q^{r/3}}\). This can repair any one super symbol (which consists of \(\frac {r}{3}\) symbols of \(\mathbb {F}_{q}\)) by contacting r _{out} symbols over \(\mathbb {F}_{q^{r/3}}\), i.e., \(r_{\text {out}}\frac {r}{3}\) symbols over \(\mathbb {F}_{q}\). (Note that in order to repair a super symbol, we can obtain the value of r _{out} required super symbols by contacting \(\frac {r}{3}\) symbols over \(\mathbb {F}_{q}\) from each of their corresponding codewords of the inner code.)
Hence, for all r<9, the concatenated codes have a higher rate than the partition codes.
5.2 When ℓ=4
5.3 General values of ℓ
Note that the concatenated code obtained in this section has a minimum distance of at least \((x+1)\left (\left \lfloor \frac {\ell }{x+1} \right \rfloor + 1\right)\).
Remark 7.
The rate \(R\left (\frac {\ell }{2}\right) \) in (17) is strictly greater than the rate of the partition codes \(\frac {r}{r + \ell ^{2}}\) as long as \(r < \frac {\ell ^{3}}{4}\).
6 Cooperative locally repairable codes using codes on graphs
The concatenated codes described in Section 5 enable (r,ℓ)cooperative locality with better rate and minimum distance as compared to those of partition codes. However, the improvements obtained by concatenated code approach are small and limited to the bounded values of the parameter r. In this section, we present various graphbased codes that improve upon the previously described approaches for a large range of system parameters.
6.1 Bipartite graphs with large girth
The girth of a graph is the number of vertices in the shortest cycle of the graph. In this section, we explore a particular class of codes based on bipartite graphs with high girth. In this construction, the code symbols are associated with the edges of a bipartite graph and both the left and right vertices in the the bipartite graph enforces the constraints on the code symbols associated with the edges incident on these vertices. The analysis of the cooperative locality of the codes obtained in this manner is based on the fact that the underlying bipartite graph has high girth.

We assign each edge in the bipartite graph \(\mathcal {G}(\mathcal {V},\mathcal {E})\) with a code symbol in the codewords of \({\mathcal C}\). That is, \(\mathcal {C} \subseteq \mathbb {F}_{q}^{\mathcal {E}}\).

For every (left or right) vertex in the bipartite graph, all the code symbols associated with the edges incident on the vertex satisfy a linear constraint (over \(\mathbb {F}_{q}\)).
Theorem 2.
Let \({\mathcal G}\) be a Δregular bipartite graph with girth g, then the code \({\mathcal C}\) obtained from the construction described above has ((g−1)(Δ−1),g−1)cooperative locality.
Proof.
A bipartite graph can only have cycles of even length (number of vertices or edges). Note that as we explain this before stating this theorem, the code \({\mathcal C}\) can correct up to three erasures without any assumption on the girth of the bipartite graph \({\mathcal G}\). Therefore, without loss of generality, we can assume that the girth of the bipartite graph \({\mathcal G}\) is at least six^{3}, i.e., g≥6. We use induction over the number of erasures to prove the claim. For the base case, we consider the case of ℓ=3 erasures. As described in the paragraph preceding the statement of this theorem, the code \({\mathcal C}\) can recover from three erasures in a cooperative manner.
Now as an inductive hypothesis, we assume that the code \({\mathcal C}\) can repair at most ℓ≤g−2 erasures in a cooperative manner and show that it is also possible to repair ℓ+1≤g−1 erasures. Towards this, we show that given ℓ+1 erasures, it is possible to obtain a local constraint which has a single erasure among the code symbols appearing in the constraint. Finding such a constraint allow for the recovery of one erasure leaving ℓ erasures. In order to show a contradiction, we assume that no such local constraint exists. We start with a vertex say \(u_{1} \in {\mathcal U}\) with at least two of the code symbols associated with the edges incident on it in erasure. We then traverse along one of the edges out of the vertex u _{1} which have their corresponding code symbols in erasure. (Note that there are at least two of such edges.) Let \(v_{1} \in {\mathcal V}\) denote the vertex that we arrive at after traversing the edge. Since v _{1} has at least two code symbols associated with its edges in erasure, we can now pick an edge associated with one of the erased symbol to reach another vertex \(u_{2} \in {\mathcal U}\) which is different from u _{1}. We continue this process until we cannot traverse to an unexplored vertex through an edge with its associated symbol in erasure. Note that this process is bound to end in at most ℓ+1 steps as there are only ℓ+1 erasures. This process can end with two possibilities: (1) we have traversed through all edges associated with erased symbols or (2) all the unexplored edges from the last vertex leads to previously visited vertices. The first possibility is not feasible under our assumption as it implies that the last vertex has only single erasure associated with the edges incident on it. The second possibility leads to the existence of cycle of length at most ℓ+1 which is infeasible as ℓ+1≤g−1. This leads to a contradiction. Thus, it is possible to obtain a local constraint which has a single erasure among the code symbols appearing in the constraint. Now that we are remained with ℓ erasures, we can employ the inductive hypothesis to complete the proof.
As for the total number of intact code symbols contacted during the repair process, in the worst case, we may need to utilize g−1 different local constraints to recover from g−1 erasures. This amounts to contacting (g−1)(Δ−1) intact code symbols.
Remark 8.
(Construction of regular bipartite graphs with large girth) The problem of constructing regular bipartite graphs with large girth has received significant attention in the past. Here, we like to point out the work presented in [15, 25] and references therein. For an odd integer k≥1 and prime power q, Lazebnik et al. present explicit construction for qregular bipartite graphs with girth at least k+5 and number of edges q ^{ k−1} [15]. Therefore, for any ℓ, one can design a code using a regular bipartite graph from [15] which ensures cooperative local repair of any ℓ erasures.
6.1.1 Rate and distance of \({\mathcal C}\) obtained from a regular bipartite graph
where \(\tilde {d}_{\min }\) is the minimum distance of the smaller code associated with each vertex in the graph \({\mathcal G}\). For our case of \(\tilde {d}_{\min } = 2\), (20) does not give us anything better than (19).
Remark 9.
The relationship between stopping number, the smallest number of erasures that cannot be corrected under iterative decoding, and the girth of the Tanner graph associated with a code have been previously explored in the literature [27]. As described above, we can obtain a Tanner graph \({\mathcal H}\) corresponding to the graph \({\mathcal G}\). This allows us to draw the connections between Theorem 2 and the literature on stopping number.
Remark 10.
Compared to (7), this achievability result has a loss of at most \(\frac {\ell }{r+\ell }\) from the optimal possible rate.
6.1.2 Comparison with the work in [24]
Recently, Prakash et al. study codes which allow for local repair of two erasures [24]. In their model, they perform the repair of the two erasures in a successive manner, where a parity constraint of weight at most \(\tilde {r} + 1\) is used to repair each of the two erasures. In [24], Prakash et al. show that such codes have their rates upper bounded by \(\frac {\tilde {r}}{\tilde {r} + 2}\).
Note that their model can be generalized to ℓ≥2 erasures, and one can consider codes that enable successive local repairs from ℓ erasures by contacting ℓ parity constraints of weight at most \(\tilde {r} + 1\). The codes based on bipartite graphs with high girth, as proposed in this section, fall under this setting. Taking \(\tilde {r} = \frac {r}{\ell }\), their rate (cf. (18)) is at least \(\frac {\tilde {r}  1}{\tilde {r} + 1}\). Since the upper bound \(\frac {\tilde {r}}{\tilde {r} + 2}\) from [24] still applies to these codes, they exhibit almost optimal rate.
6.2 Expander graphs
The above analysis of the construction based on bipartite graphs fails to show a high minimum distance on top of the local repair property. However, with the graphical construction, it is also possible to have high distance, and hence protection against catastrophic failures. Next, we show how the expansion property of graphs leads to such conclusion.
6.2.1 Unbalanced bipartite expanders
Here, \(\Gamma ({\mathcal S}) \subseteq {\mathcal V}\) denotes the set of right nodes that constitute the neighborhood of the nodes in the set \({\mathcal S}\).
We now associate a code symbol with each of the left nodes in the bipartite graph \({\mathcal G}\). For \(v \in {\mathcal V}\), let \(\Gamma (v) \subseteq {\mathcal U}\) denote the neighborhood of the node v. Consider a code \({\mathcal C}\) such that for each \(v \in {\mathcal V}\), the code symbols associated with Γ(v) constitute a codeword in a shorter MDS code \(\mathcal {C}_{0}\) with length Δ=Γ(v) and minimum distance at least t+1. Note that this approach of constructing codes from unbalanced expander graphs is proposed in [26, 28] and references therein.
Next, we argue that for small enough ε (cf. (21)), the code \({\mathcal C}\) should be able to correct any set of at most ℓ erasures. Note that the locality parameter r is dictated by the degrees of the right nodes in the graph \({\mathcal G}\).
Theorem 3.
Let \({\mathcal G}\) be an unbalanced (left) expander bipartite graph as defined in (21). If we have \(\epsilon < 1  \frac {1}{t+1}\), then the code \({\mathcal C}\) can be locally repaired from any ℓ or less number of erasures by contacting at most \( \ell \Delta \cdot \text {rate}({\mathcal C}_{0})\) code symbols.
Proof.
We prove the claim using induction on ℓ. Note that a single erasure can be repaired by using one of the local constraints the erased code symbol participates in. Now assume that at most ℓ−1 erasures can be repaired by using local constraints defined by the graph \({\mathcal G}\). We now show that any set of ℓ erasures can also be repaired using local constraints.
Let \({\mathcal S} \subseteq {\mathcal U}\) with \({\mathcal S} \leq \ell \) denote the set of ℓ erased code symbols. In order to repair these ℓ erasures, we start with a right node which has at most t of the code symbols associated with its neighborhood in erasure. These t erasures can be corrected under the local constraints satisfied by the code \({\mathcal C}\). We can then utilize the inductive hypothesis to complete the proof.
This along with (22) leads to a contradiction. Hence, in the presence of at most ℓ erasures, it is possible to find the desirable right node (with at most t erasures among the code symbols associated with its neighborhood).
Now the claim that \(r \leq \ell \Delta \cdot \text {rate}({\mathcal C}_{0})\) follows from the fact that correcting each erasure requires contacting at least \(\Delta \cdot \text {rate}({\mathcal C}_{0})\) code symbols from a codeword of the shorter code \({\mathcal C}_{0}\).
Proposition 1.
where \(r = \ell \Delta \cdot \text {rate}({\mathcal C}_{0})\) denotes the maximum number of intact code symbols that need to be contacted to repair ℓ erasures.
Remark 11.
Here, we note that for any constant ε>0 and δ<1, it is possible to explicitly construct unbalanced expander graphs with constant degree h, m=δ n and expansion factor (1−ε)h for Ω(n) sized subsets of left vertices [29].
6.2.2 Regular expander graph
We now study the cooperative locality of the codes obtained by the double covers of Δregular expander graphs [28]. The analysis of the cooperative locality is based on the analysis of the decoding algorithm for these codes presented in [30]. Note that we naturally modify the decoding algorithm from [30] to perform erasure correction in a cooperative manner.

Each vertex \(u \in {\mathcal V}\) in the original graph \({\mathcal G}\) corresponds to a left node \(u_{l} \in {\mathcal V}_{0}\) and a right node \(u_{r} \in {\mathcal V}_{1}\) in the graph \(\widetilde {{\mathcal G}}\).

For a pair of vertices \((u_{l}, v_{r}) \in {\mathcal V}_{0} \times {\mathcal V}_{1}\), there exists an edge \((u_{l}, v_{r}) \in \widetilde {{\mathcal E}}\) iff there is an edge between the vertices u and v in the original graph \({\mathcal G}\), i.e., \((u, v) \in {\mathcal E}\).
The bipartite graph \(\widetilde {{\mathcal G}}\) is referred to as the double cover of the graph \({\mathcal G}\). Note that the bipartite graph \(\widetilde {{\mathcal G}}\) is Δregular with total n=N Δ edges. Moreover, the following result holds for the bipartite graph \(\widetilde {{\mathcal G}}\).
Lemma 1.
where \(\widetilde {{\mathcal E}}({\mathcal S} \times {\mathcal T})\)denotes the collection of the edges from the nodes in the set \({\mathcal S}\) to the nodes in the set \({\mathcal T}\).
We use \({\mathcal S}^{i}\) for i≥2 to denote the set of (left or right) vertices that have erasures among the Δ code symbols associated with them in the beginning of ith round and did not attempt to correct those erasures. Note that \({\mathcal S}^{i} \subseteq {\mathcal V}_{0}\) and \({\mathcal S}^{i} \subseteq {\mathcal V}_{1}\) when i is an odd and even round of decoding, respectively. Next, we employ the expander mixing lemma (cf. Lemma 1) to show that \(\big \{{\mathcal S}^{1}, {\mathcal S}^{2}, {\mathcal S}^{3}, \ldots \big \}\) is a strictly decreasing sequence.
Lemma 2.
Proof.
It follows from the Lemma 2 that in at most logarithmic (in ℓ) rounds of decoding, the algorithm described in Fig. 4 can correct ℓ erasures.
The codes based on the double covers of Δregular expander graphs have been studied in the coding theory literature before (see, e.g., [30]). The rate and the minimum distance of the code \({\mathcal C}\) depends on the rate and the minimum distance of the code \({\mathcal C}_{0}\). Note that \({\mathcal C}_{0}\) characterizes the local constraints associated with the vertices in the bipartite graph \(\widetilde {{\mathcal G}}\). In particular, if \(\text {rate}({\mathcal C}_{0})= R\) and \(d_{\min }({\mathcal C}_{0}) = \delta \Delta \), then we have that \(\text {rate}({\mathcal C}) \geq 2R 1\) and \(d_{\min }({\mathcal C}) \geq \delta (\delta  \frac {\lambda }{\Delta })n\) [28, 30].
In the next section, we show an explicit family of algebraic codes that exhibit very strong cooperative local repair property, as well as a very high minimum distance.
7 Cooperative local repair for Hadamard codes
In this section, we study the cooperative locality for punctured Hadamard codes. Punctured Hadamard codes are also referred to as Simplex codes, which are the dual codes of Hamming codes. These codes are well known to be locally decodable codes (LDCs) [32] and have multiple disjoint repair groups for each code symbols. Here, we comment on the exact parameters for the cooperative locality of these codes. In particular, we show that an [ n=2^{ k }−1,k,2^{ k−1}]_{2} punctured Hadamard code has (r=ℓ+1,ℓ)cooperative locality for any \(\ell \leq \frac {n1}{2}\).
Here, \(\textbf {b}^{i} \!\!= \left ({b^{i}_{1}}, {b^{i}_{2}},\ldots, {b^{i}_{k}}\right) \in \mathbb {F}_{2}^{k}\) denotes the binary representation of the integer i∈ [ 2^{ k }−1]. In an \(\left [n = 2^{k}  1, k, 2^{k1}\right ]_{2}\) punctured Hadamard code, we have \(c_{i} + c_{2^{j}} = c_{i + 2^{j}}\phantom {\dot {i}\!}\), where 1≤j≤k−1 and i∈ [ 2^{ j }−1]. Moreover, we note that an \(\left [n = 2^{k}  1, k, 2^{k  1}\right ]_{2}\) punctured Hadamard code has a particular structural property: for any \(2 \leq \widetilde {k} < k\), the prefix of length \(2^{\widetilde {k}}  1\) of each codeword is a codeword of the \(\left [\widetilde {n} = 2^{\widetilde {k}}  1, \widetilde {k}, 2^{\widetilde {k}  1}\right ]_{2}\) punctured Hadamard code which encodes the message \((m_{1}, m_{2},\ldots, m_{\widetilde {k}})\). We now present the main result of this subsection:
Theorem 4.
In an \(\left [n = 2^{k}  1, k, 2^{k  1}\right ]_{2}\) punctured Hadamard code, any \(1 \leq \ell \leq \frac {n1}{2}\) erasures can be corrected by contacting at most ℓ+1 other code symbols.
Proof.
We prove the theorem by using induction over k. For base case, we consider k=2, where the [ n=3=2^{2}−1,2,2]_{2} punctured Hadamard code encodes the message (m _{1},m _{2}) to a codeword (c _{1},c _{2},c _{3})=(m _{1},m _{2},m _{1} + m _{2}). In this case, any \(1 \leq \ell \leq \frac {31}{2} = 1\) erasure can be recovered by contacting other ℓ+1=2 code symbols. For example, one can recover c _{2}=m _{2} from (c _{1},c _{3})=(m _{1},m _{1}+m _{3}).

Case 1: There are x≤2^{ k−2}−1 erasures among the first \(\widehat {n} = 2^{k1}  1\) code symbols. Note that the first \(\widehat {n} = 2^{k1}  1\) code symbols constitute a codeword of an \(\left [\widehat {n} = 2^{k1}  1, k  1, 2^{k2}\right ]_{2}\) punctured Hadamard code. Therefore, from the inductive hypothesis, one can correct the x erasures among the first \(\widehat {n}\) code symbols by contacting x+1 other code symbols out of these \(\widehat {n}\) code symbols. Now, if the symbol \(c_{2^{k1}}\phantom {\dot {i}\!}\) in erasure, we can recover it by contacting one of the intact symbol among \(\left \{c_{2^{k1} + 1}, c_{2^{k  1} + 2},\ldots, c_{n = 2^{k}1}\right \}\) say \(c_{2^{k1} + j}\phantom {\dot {i}\!}\) and the corresponding code symbol c _{ j } from the first \(\widehat {n}\) code symbols. Now, we can repair the remaining erased symbols among \(\left \{c_{2^{k1} + 1}, c_{2^{k  1} + 2},\ldots, c_{n = 2^{k}1}\right \}\) from \(c_{2^{k1}}\phantom {\dot {i}\!}\) and the corresponding code symbol among the first \(\widehat {n}\) code symbols. For example, if we want to recover the symbol \(c_{2^{k1} + m}\phantom {\dot {i}\!}\), we can use \(c_{2^{k1}}\phantom {\dot {i}\!}\) and c _{ m } to reconstruct \(c_{2^{k1} + m}\phantom {\dot {i}\!}\). In the worst case, we contact ℓ+1 code symbols during the repair of all ℓ erasures.

Case 2: There are x≥2^{ k−2} erasures among the first \(\widehat {n} = 2^{k1}  1\) code symbols. In this case, we first recover the code symbol \(c_{2^{k1}}\phantom {\dot {i}\!}\) if it is in erasure. Without loss of generality, we assume that \(c_{2^{k1}}\phantom {\dot {i}\!}\) is in erasure. Note that there are \(\frac {n1}{2} = 2^{k1}\) distinct pairs of code symbols \(\left \{c_{i}, c_{2^{k1} + i}\right \}_{i \in [2^{k1}]}\phantom {\dot {i}\!}\) that can recover \(c_{2^{k1}}\phantom {\dot {i}\!}\). Since we have at most \(\frac {n1}{2}  1 = 2^{k1}  1\) erasures apart from \(c_{2^{k1}}\phantom {\dot {i}\!}\), one of the 2^{ k−1} pairs \(\left \{c_{i}, c_{2^{k1} + i}\right \}_{i \in [2^{k1}]}\phantom {\dot {i}\!}\) must be intact. This pair allows us to recover \(c_{2^{k1}}\phantom {\dot {i}\!}\).
Now that we know the symbol \(c_{2^{k1}} = m_{k}\phantom {\dot {i}\!}\), we can remove the contribution of m _{ k } from any of the last \(2^{k}  1  2^{k}\phantom {\dot {i}\!}\) code symbols \(\left \{c_{2^{k1} + 1}, c_{2^{k  1} + 2},\ldots, c_{n = 2^{k}1}\right \}\). Similarly, we can add m _{ k } to any of the first \(\widehat {n} = 2^{k1}  1\) code symbols \(\{c_{1}, c_{2},\ldots, c_{2^{k1}}\}\phantom {\dot {i}\!}\). Therefore, we can reduce the case 2 to case 1 of the proof and repair any ℓ _{1} erasures by contacting at most ℓ _{1}+1 code symbols.
Combining both cases completes the proof.
Remark 12.
Note that, for each symbol, the punctured Hadamard code provides \(\frac {n1}{2}\) disjoint repair groups. Moreover, each of these repair groups comprises two symbols. Therefore, it easily follows from the discussion of Section 2.1 that the punctured Hadamard code has (2ℓ,ℓ)cooperative locality for \(\ell \leq \frac {n1}{2}\). Here, we show that these codes allow for more efficient cooperative local repair mechanism by establishing (ℓ+1,ℓ)cooperative locality for them.
8 Conclusions
All the constructions of this paper are designed to allow for the cooperative local repairs in the case of adversarial erasure patterns. One can consider the setting where erasures occur according to a random model. Here, we briefly comment on the setting where ℓ erasures are uniformly distributed among the code symbols. Moreover, we assume r and ℓ to be large enough. In that case, we claim that even the simple partition codes of Section 4.1 are asymptotically optimal. This is true, because with reasonably high probability (depending on r and ℓ), every local group (a total p of them) experiences less than about \( t \equiv \Theta \Big (\frac {\ell }{p} \log \frac {\ell }{p} \Big) \) number of erasures. Therefore, with high probability, one can perform cooperative local repair of ℓ random erasures even if an \(\left (\frac {r}{\ell } + t, \frac {r}{\ell }\right)\) MDS code in employed in the construction of the partition code (cf. Section 4.1). This translates to a coding scheme with the overall rate of \(\frac {r}{r + \ell t}\). One can take p large enough to optimize this value. Indeed, it is possible to attain a rate of \(\frac {r}{r + \ell ^{1+\epsilon }}\) for some ε > 0. Comparing with (7), we see that partition codes are nearoptimal in this case. Here, note that it was shown in [33] that for a random erasure channel, the partition codes are asymptotically optimal in terms of achieving capacity.
8.1 Part of the proof of Theorem 1
where (a) follows from the fact that \({\mathcal I}_{t}\) is union of the disjoint sets \({\mathcal A}_{j}\).
This completes the proof.
8.2 Proof of Proposition 1
Therefore, \(U_{t}({\mathcal A}) \ge (1\epsilon \epsilon /t) h{\mathcal A}\).
For any codeword of \(\mathcal {C}\) whose support is given by the vertex set \({\mathcal S} \subset {\mathcal U}\), we must have \(U_{t}(\mathcal {S}) = \emptyset \). Clearly, when \(\mathcal {S} \le \alpha n\), \(U_{t}(\mathcal {S}) \ge (1\epsilon \epsilon /t) h{\mathcal S} >0\). Let us assume \(\mathcal {S} > \alpha n\) but \(\mathcal {S} \le (2\epsilon  \epsilon /t) \alpha n\). Let \(\mathcal {Q}\) be a proper subset of \(\mathcal {S}\) such that \(\mathcal {Q} = \alpha n\). The number of edges coming out of \(\mathcal {S} \!\setminus \! \mathcal {Q}\) is \(h (\mathcal {S}  \alpha n) \le h(1\epsilon \epsilon /t) \alpha n\). On the other hand, \(U_{t}(\mathcal {Q}) \ge (1\epsilon \epsilon /t) h \alpha n\). Hence, \(U_{t}(\mathcal {S}) \ne \emptyset \).
This proves that the minimum distance of the expander code is at least (2−ε−ε/t)α n.
9 Endnotes
^{1} Throughout this paper, we use both “codes with small locality” and “locally repairable codes” to refer to the codes that enable local repair of a single failed code symbol.
^{2} This assumption is just for the ease of exposition and a similar construction for odd ℓ can also be proposed.
^{3} Note that Theorem 2 guarantees cooperative local repair of only ℓ=3 erasures when g=4.
^{4} As shown above, α n≥ℓ is a sufficient condition for the code obtained from the bipartite graph \({\mathcal G}\) to be able to allow for cooperative repair of ℓ erasures.
^{5} If d=λ _{1}≥λ _{2}≥λ _{3}≥…≥λ _{ N } be N eigenvalues of the adjacency matrix of \({\mathcal G}\), then \(\lambda = \max \{\lambda _{2}, \lambda _{N}\}\).
Declarations
Acknowledgements
A. Mazumdar’s research in this paper is supported by NSF CAREER grant CCF 1453121 and grant CCF1318093. S. Vishwanath would like to acknowledge support from Army Research Office under grant W911NF1110258. A part of this paper was presented at the 48th Annual Conference on Information Sciences and Systems on March 2014.
Open Access This article is distributed under the terms of the Creative Commons Attribution 4.0 International License (http://creativecommons.org/licenses/by/4.0/), which permits unrestricted use, distribution, and reproduction in any medium, provided you give appropriate credit to the original author(s) and the source, provide a link to the Creative Commons license, and indicate if changes were made.
Authors’ Affiliations
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