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| '''Disjunct''' and '''separable matrices''' play a pivotal role in the mathematical area of non-adaptive [[group testing]]. This area investigates efficient designs and procedures to identify 'needles in haystacks' by conducting the tests on groups of items instead of each item alone. The main concept is that if there are very few special items (needles) and the groups are constructed according to certain combinatorial guidelines, then one can test the groups and find all the needles. This can reduce the cost and the labor associated with of large scale experiments. | |
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| The grouping pattern can be represented by a <math>t\times n</math> binary matrix, where each column represents an item and each row represents a pool. The symbol '1' denotes participation in the pool and '0' absence from a pool. The ''d''-disjunctness and the ''d''-separability of the matrix describe sufficient condition to identify ''d'' special items.
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| In a matrix that is ''d''-separable, the [[Boolean sum]] of every ''d'' columns is unique. In a matrix that is ''d''-disjunct the Boolean sum of every ''d'' columns does not contain any other column in the matrix. Theoretically, for the same number of columns (items), one can construct ''d''-separable matrices with fewer rows (tests) than ''d''-disjunct. However, designs that are based on ''d''-separable are less applicable since the decoding time to identify the special items is exponential. In contrast, the decoding time for ''d''-disjunct matrices is polynomial.
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| ==''d''-separable==
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| '''Definition:''' A <math>t\times n</math> matrix <math>M</math> is <math>d</math>-separable if and only if <math> \forall S_1 \neq S_2 \subseteq [n]</math> where <math>|S_1|,|S_2| \leq d</math> such that <math>\bigcup_{j \in S_1} M_j \neq \bigcup_{i \in S_2} M_i</math>
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| ===Decoding algorithm===
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| First we will describe another way to look at the problem of group testing and how to decode it from a different notation. We can give a new interpretation of how group testing works as follows:
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| '''Group testing:''' Given input <math>M</math> and <math>\mathbf{r}</math> such that <math>\mathbf{r} = M \mathbf{x}</math> output <math>\mathbf{x}</math>
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| * Take <math> M_j </math> to be the <math> j^{th} </math> column of <math>M</math>
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| * Define <math> S_{M_j} \subseteq [t] </math> so that <math> M_j(i) = 1 </math> if and only if <math> i \in S_{M_j} </math>
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| * This gives that <math> S_\mathbf{r} = \bigcup_{j \in [n], \mathbf{x}_j = 1} S_{M_j} </math>
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| This formalizes the relation between <math>\mathbf{x}</math> and the columns of <math>M</math> and <math>\mathbf{r}</math> in a way more suitable to the thinking of <math>d</math>-separable and <math>d</math>-disjunct matrices. The algorithm to decode a <math>d</math>-separable matrix is as follows:
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| Given a <math>t\times n</math> matrix <math>M</math> such that <math>M</math> is <math>d</math>-separable:
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| # For each <math>T \subseteq [n]</math> such that <math>|T| \leq d</math> check if <math>S_\mathbf{r} = \bigcup_{j \in T} S_{M_j} </math>
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| This algorithm runs in time <math>n^{\mathcal{O}(d)}</math>.
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| ==''d''-disjunct==
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| In literature disjunct matrices are also called super-imposed codes and ''d''-cover-free families.
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| '''Definition:''' A <math>t</math> x <math>n</math> matrix <math>M</math> is ''d-disjunct'' if <math>\forall S \subseteq [n]</math> such that <math>|S| \leq d</math>, <math>\forall j \notin S</math> <math> \exists i</math> such that <math>M_{i,j} = 1</math> but <math>\forall k \in S, M_{i,k} = 0</math>.
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| Denoting <math> M_a </math> is the <math>a^{th}</math> column of <math>M</math> and <math>S_{M_a} \subseteq [t]</math> where <math> M_a(b) = 1 </math> if and only if <math> b \in S_{M_a} </math> gives that <math>M</math> is <math>d</math>-disjunct if and only if <math> S_{M_j} \subsetneq \cup_{k \in S} S_{M_k}</math>
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| <!--break-->
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| '''Claim:''' <math>M</math> is <math>d</math>-disjunct implies <math>M</math> is <math>d</math>-separable
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| ''Proof: (by contradiction)'' Let <math>M</math> be a <math>t</math> x <math>n</math> <math>d</math>-disjunct matrix. Assume for contradiction that <math>M</math> is not <math>d</math>-separable. Then there exists <math>T_1, T_2 \in [n]</math> and <math>T_1 \neq T_2</math> with <math>|T_1|,|T_2| \leq d</math> such that <math>\bigcup_{i \in T_1} M_i = \cup_{i \in T_2} S_{M_i}</math>. This implies that <math> \exists j \in T_2 \setminus T_1 </math> such that <math> S_{M_j} \subseteq \bigcup_{k \in T_1} T_{M_k}</math>. This contradicts the fact that <math>M</math> is <math>d</math>-disjunct. Therefore <math>M</math> is <math>d</math>-separable. <math>\Box </math>
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| ===Decoding algorithm===
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| The algorithm for <math>d</math>-separable matrices was still a polynomial in <math>n</math>. The following will give a nicer algorithm for <math>d</math>-disjunct matrices which will be a <math>d</math> multiple instead of raised to the power of <math>d</math> given our bounds for <math>t</math>. The algorithm is as follows in the proof of the following lemma: | |
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| '''Lemma 1:''' There exists an <math>\mathcal{O}(nt)</math> time decoding for any <math>d</math>-disjunct <math>t</math> x <math>n</math> matrix.
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| *'''Observation 1:''' For any matrix <math>M</math> and given <math>M\mathbf{x} = \mathbf{r}</math> if <math>\mathbf{r}_i = 1 </math> it implies <math> \exists j </math> such that <math> M_{i,j} = 1 </math> and <math> \mathbf{x}_j = 1 </math> where <math> 1 \leq i \leq t </math> and <math> 1 \leq j \leq n </math>. The opposite is also true. If <math>\mathbf{r}_i = 0 </math> it implies <math> \forall j </math> if <math> M_{i,j} = 1 </math> then <math> \mathbf{x}_j = 0 </math>. This is the case because <math>\mathbf{r}</math> is generated by taking all of the logical or of the <math> \mathbf{x}_j</math>'s where <math> M_{i,j} = 1 </math>.
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| *'''Observation 2:''' For any <math>d</math>-disjunct matrix and every set <math> T = \{j | \mathbf{x}_j = 1\} </math> where <math> |T| \leq d </math> and for each <math> j \notin T </math> where <math> 1 \leq j \leq n </math> there exists some <math>i</math> where <math> 1 \leq i \leq t </math> such that <math> M_{i,j} = 1</math> but <math> M_{i,l} = 0 \text{ }\forall l \in T</math>. Thus, if <math>\mathbf{r}_i = 0 </math> then <math>\mathbf{x}_j = 0</math>.
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| ''Proof of Lemma 1:'' Given as input <math> \mathbf{r} \in \{0,1\}^t, M </math> use the following algorithm:
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| # For each <math> j \in [n] </math> set <math>\mathbf{x}_j = 1 </math>
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| # For <math> i = 1 \ldots t </math>, if <math> \mathbf{r}_i = 0 </math> then for all <math> j \in [n] </math>, if <math> M_{i,j} = 1 </math> set <math> \mathbf{x}_j = 0 </math>
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| By Observation 1 we get that any position where <math>\mathbf{r}_i = 0 </math> the appropriate <math> \mathbf{x}_j </math>'s will be set to 0 by step 2 of the algorithm. By Observation 2 we have that there is at least one <math>i</math> such that if <math> \mathbf{x}_j</math> is supposed to be 1 then <math> M_{i,j} = 1 </math> and, if <math> \mathbf{x}_j</math> is supposed to be 1, it can only be the case that <math> \mathbf{r}_i = 1 </math> as well. Therefore step 2 will never assign <math> \mathbf{x}_j </math> the value 0 leaving it as a 1 and solving for <math>\mathbf{x}</math>. This takes time <math> \mathcal{O}(nt) </math> overall. <math>\Box</math>
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| ==Upper bounds for non-adaptive group testing ==
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| The results for these upper bounds rely mostly on the properties of <math>d</math>-disjunct matrices. Not only are the upper bounds nice, but from Lemma 1 we know that there is also a nice decoding algorithm for these bounds. First the following lemma will be proved since it is relied upon for both constructions:
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| '''Lemma 2:''' Given <math> 1 \leq d \leq n </math> let <math> M </math> be a <math>t\times n</math> matrix and:
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| # <math> \forall j \in [n] \text{, } |S_{M_j}| \geq w_\min </math>
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| # <math> \forall i \neq j \in [n], |S_{M_i} \cap S_{M_j}| \leq a_\max </math>
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| for some integers <math>a_\max \leq w_\min \leq t </math> then <math>M</math> is <math>\geq d' \left\lfloor \frac{w_\min - 1}{a_\max} \right\rfloor </math>-disjunct.
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| ''Note:'' these conditions are stronger than simply having a subset of size <math>d</math> but rather applies to any pair of columns in a matrix. Therefore no matter what column <math>i</math> that is chosen in the matrix, that column will contain at least <math>w_\min</math> 1's and the total number of shared 1's by any two columns is <math>a_\max</math>. | |
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| ''Proof of Lemma 2:'' Fix an arbitrary <math> S \subseteq [n], |S| \leq d, j \notin S </math> and a matrix <math> M </math>. There exists a match between <math>i \in S \text{ and } j \notin S</math> if column <math>i</math> has a 1 in the same row position as in column <math>j</math>. Then the total number of matches is <math> \leq a_\max \cdot d \leq a_\max \cdot (\frac{w_\min - 1}{a_\max}) = w_\min - 1 < \text{ } w_\min </math>, i.e. a column <math>j</math> has a fewer number of matches than the number of ones in it. Therefore there must be a row with all 0s in <math>S</math> but a 1 in <math>j</math>. <math>\Box </math>
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| We will now generate constructions for the bounds.
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| === Randomized construction ===
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| This first construction will use a probabilistic argument to show the property wanted, in particular the [[Chernoff bound]]. Using this randomized construction gives that <math> t(d,n) \leq \mathcal{O}(d^2 \log n) </math>. The following lemma will give the result needed.
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| '''Theorem 1:''' There exists a random <math>d</math>-disjunct matrix with <math>\mathcal{O}(d^2 \log n) </math> rows.
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| ''Proof of Theorem 1:'' Begin by building a random <math>t\times n</math> matrix <math> M </math> with <math> t = cd^2 \log n </math> (where <math>c</math> will be picked later). It will be shown that <math>M </math> is <math>\Omega(d)</math>-disjunct. First note that <math>M_{i,j} \in \{0,1\}</math> and let <math>M_{i,j} = 1</math> independently with probability <math>\frac{1}{d}</math> for <math>i \in [t] </math> and <math>j \in [n] </math>. Now fix <math> j \in [n] </math>. Denote the <math>j^{th}</math> column of <math>M</math> as <math>T_j \subseteq [t] </math>. Then the expectancy is <math>\mathbb{E}[|T_j|] = \frac{t}{d}</math>. Using the Chernoff bound, with <math>\mu = \frac{1}{2} </math>, gives <math> \mathrm{Pr}[ |T_j| < \frac{t}{2d}] \leq e^{\frac{-t}{12d}} = e^{\frac{-cd\log n}{12}} \leq n^{-2d} [</math>if <math> c \geq 24 ]</math>. Taking the [[Boole's inequality|union bound]] over all columns gives <math> \mathrm{Pr}[\exists j</math>, <math> |T_j| < \frac{t}{2d}] \leq n \cdot n^{-2d} \leq n^{-d}</math>. This gives <math> \mathrm{Pr}[\forall j </math>, <math> |T_j| \geq \frac{t}{2d}] \geq 1 - n^{-d}</math>. Therefore <math> w_\min \geq \frac{t}{2d} </math> with probability <math> \geq 1 - n^{-d} </math>.
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| Now suppose <math>j \neq k \in [n] </math> and <math> i \in [t]</math> then <math>\mathrm{Pr} [M_{i,j} = M_{i,k} = 1] = \frac{1}{d^2} </math>. So <math>\mathbb{E}[|T_j \cap T_k|] = \frac{t}{d^2}</math>. Using the Chernoff bound on this gives <math>\mathrm{Pr}[ |T_j \cap T_k| > \frac{2t}{d^2}] \leq e^{\frac{-t}{3d^2}} = e^{-2\log n} \leq n^{-4} [</math>if <math> c \geq 12 ]</math>. By the union bound over <math>(j,k) </math> pairs <math> \mathrm{Pr}[\exists (j,k) </math> such that <math> |T_j \cap T_k| > \frac{2t}{d^2}] \leq n^2 \cdot n^{-4} = n^{-2}</math>. This gives that <math> a_\max \leq \frac{2t}{d^2} </math> and <math>w_\min \geq \frac{t}{2d} </math> with probability <math> \geq 1 - n^{-d} - n^{-2} \geq 1 - \frac{1}{n} </math>. Note that by changing <math> c </math> the probability <math>1 - \frac{1}{n}</math> can be made to be <math>1 - \frac{1}{poly(n)}</math>. Thus <math> d' = \lfloor\frac{\frac{t}{2d} - 1}{\frac{2t}{d^2}}\rfloor \approx \frac{d}{4} </math>. By setting <math> d </math> to be <math> 4d </math>, the above argument shows that <math> M</math> is <math>d</math>-disjunct.
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| Note that in this proof <math> t = d^2\log n </math> thus giving the upper bound of <math> t(d,n) \leq \mathcal{O}(d^2 \log n) </math>. <math>\Box </math>
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| === Strongly explicit construction ===
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| It is possible to prove a bound of <math> t(d,n) \leq \mathcal{O}(d^2\log^2{n}) </math> using a strongly explicit code. Although this bound is worse by a <math> \log n </math> factor, it is preferable because this produces a strongly explicit construction instead of a randomized one.
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| '''Theorem 2:''' There exists a strongly explicit <math>d</math>-disjunct matrix with <math>\mathcal{O}(d^2\log^2{n}) </math> rows.
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| This proof will use the properties of [[concatenated code]]s along with the properties of disjunct matrices to construct a code that will satisfy the bound we are after.
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| ''Proof of Theorem 2:''
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| Let <math> C \subseteq \{0,1\}^t, |C| = n </math> such that <math> C = \{\mathbf{c}_1,\ldots,\mathbf{c}_n\} </math>. Denote <math>M_C</math> as the matrix with its <math>i^{th}</math> column being <math>\mathbf{c}_i</math>. If <math>C^*</math> can be found such that
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| # <math> \forall i \in C^* \text{, } |\mathbf{c}_i| \geq w_\min </math>
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| # <math> \forall \mathbf{c}^1 \neq \mathbf{c}^2 \in C^* \text{, } |\{i | \mathbf{c}^1_i = \mathbf{c}^2_i = 1\}| \leq a_\max </math>,
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| then <math> M_{C^*} </math> is <math> \lfloor \frac{w_\min - 1}{a_\max} \rfloor </math>-disjunct. To complete the proof another concept must be introduced. This concept uses code concatenation to obtain the result we want.
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| '''Kautz-Singleton '64'''
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| Let <math>C^* = C_{out} \circ C_{in}</math>. Let <math>C_{out}</math> be a <math>[q,k]_q</math>-[[Reed-solomon codes|Reed–Solomon code]]. Let <math>C_{in} = [q] \rightarrow \{0,1\}^q</math> such that for <math>i \in [q]</math>, <math>c_{in}(i) = (0,\ldots,0,1,0,\ldots,0)</math> where the 1 is in the <math>i^{th}</math> position. Then <math>n = q^k</math>, <math>t = q^2</math>, and <math>w_\min = q</math>.
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| ---
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| ''Example:'' Let <math>k = 1, q = 3, C_{out} = \{(0,0,0), (1,1,1), (2,2,2)\}</math>. Below, <math>M_C</math> denotes the matrix of codewords for <math>C_{out}</math> and <math>M_{C^*}</math> denotes the matrix of codewords for <math>C^* = C_{out} \circ C_{in}</math>, where each column is a codeword. The overall image shows the transition from the outer code to the concatenated code.
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| <math>M_C=\begin{bmatrix}0&1&2\\0&1&2\\0&1&2\end{bmatrix}\quad\Rightarrow\quad M_{C^*}=\begin{bmatrix}0&0&1\\0&1&0\\1&0&0\\0&0&1\\0&1&0\\1&0&0\\0&0&1\\0&1&0\\1&0&0\end{bmatrix}</math>
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| ---
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| Divide the rows of <math>M_{C^*}</math> into sets of size <math>q</math> and number them as <math>(i,j) \in [q] \times [q]</math> where <math>i</math> indexes the set of rows and <math>j</math> indexes the row in the set. If <math>M_{(i,j),k_1} = M_{(i,j),k_2} = 1</math> then note that <math>\mathbf{c}_{k_1}(i) = \mathbf{c}_{k_2}(i) = j</math> where <math>\mathbf{c}_{k_1}, \mathbf{c}_{k_2} \in C_{out} </math>. So that means <math>|M_{k_1} \cap M_{k_2}| = q - \Delta(\mathbf{c}_{k_1}, \mathbf{c}_{k_2})</math>. Since <math> \Delta(\mathbf{c}_{k_1}, \mathbf{c}_{k_2}) \geq q - k + 1</math> it gives that <math>|M_{k_1} \cap M_{k_2}| \leq k - 1</math> so let <math>a_\max = k - 1</math>. Since <math>t = q^2</math>, the entries in each column of <math>M_{C^*}</math> can be looked at as <math>q</math> sets of <math>q</math> entries where only one of the entries is nonzero (by definition of <math>C_{in}</math>) which gives a total of <math>q</math> nonzero entries in each column. Therefore <math>w_\min = q </math> and <math>d =_{def} \lfloor \frac{w_\min - 1}{a_\max} \rfloor</math> (so <math>M_{C^*}</math> is <math>d</math>-disjunct).
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| Now pick <math>q</math> and <math>k</math> such that <math>\lfloor \frac{q-1}{k-1}\rfloor = d</math> (so <math>\lfloor \frac{q}{k}\rfloor \approx d</math>). Since <math>q^k = n</math> we have <math>k = \frac{\log n}{\log q} \leq \log n</math>. Since <math>q \approx kd</math> and <math>t = q^2</math> it gives that <math>t = q^2 \approx (kd)^2 \leq (d \log n)^2</math>. <math>\Box</math>
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| Thus we have a strongly explicit construction for a code that can be used to form a group testing matrix and so <math>t(d,n) \leq (d \log n)^2</math>.
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| For non-adaptive testing we have shown that <math>\Omega(d\log n) \leq t(d,n)</math> and we have that (''i'') <math>t(d,n) \leq \mathcal{O}(d^2\log^2{n})</math> (strongly explicit) and (''ii'') <math>t(d,n) \leq \mathcal{O}(d^2\log n)</math> (randomized). As of recent work by Porat and Rothscheld, they presented an explicit method construction (i.e. deterministic time but not strongly explicit) for <math>t(d,n) \leq \mathcal{O}(d^2\log n)</math>,<ref>Porat, E., & Rothschild, A. (2008). Explicit Non-adaptive Combinatorial Group Testing Schemes. In Proceedings of the 35th International Colloquium on Automata, Languages and Programming (ICALP) (pp. 748–759).</ref> however it is not shown here. There is also a lower bound for disjunct matrices of <math>t(d,n) \geq \Omega(\frac{d^2}{\log d}\log n)</math><ref>Dýachkov, A. G., & Rykov, V. V. (1982). Bounds on the length of disjunctive codes. ''Problemy Peredachi Informatsii'' [Problems of Information Transmission], 18(3), 7–13.</ref><ref>Dýachkov, A. G., Rashad, A. M., & Rykov, V. V. (1989). ''Superimposed distance codes. Problemy Upravlenija i Teorii Informacii'' [Problems of Control and Information Theory], 18(4), 237–250.</ref><ref>Zoltan Furedi, On r-Cover-free Families, ''Journal of Combinatorial Theory, Series A'', Volume 73, Issue 1, January 1996, Pages 172–173, ISSN 0097-3165, {{doi|10.1006/jcta.1996.0012}}. (http://www.sciencedirect.com/science/article/B6WHS-45NJMVF-39/2/172ef8c5c4aee2d85d1ddd56b107eef3)</ref> which is not shown here either.
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| ==Examples==
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| Here is the 2-disjunct matrix <math>M_{9 \times 12} </math>:
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| <math>
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| M_{9 \times 12} = \left[
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| \begin{array}{cccccccccccc}
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| 0 & 0 & 0 & 0 & 0 & 0 & 1 & 1 & 1 & 1 & 0 & 0 \\
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| 0 & 0 & 0 & 1 & 1 & 1 & 0 & 0 & 0 & 1 & 0 & 0 \\
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| 1 & 1 & 1 & 0 & 0 & 0 & 0 & 0 & 0 & 1 & 0 & 0 \\
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| 0 & 0 & 1 & 0 & 0 & 1 & 0 & 0 & 1 & 0 & 1 & 0 \\
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| 0 & 1 & 0 & 0 & 1 & 0 & 0 & 1 & 0 & 0 & 1 & 0 \\
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| 1 & 0 & 0 & 1 & 0 & 0 & 1 & 0 & 0 & 0 & 1 & 0 \\
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| 0 & 1 & 0 & 1 & 0 & 0 & 0 & 0 & 1 & 0 & 0 & 1 \\
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| 0 & 0 & 1 & 0 & 1 & 0 & 1 & 0 & 0 & 0 & 0 & 1 \\
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| 1 & 0 & 0 & 0 & 0 & 1 & 0 & 1 & 0 & 0 & 0 & 1
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| \end{array}
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| \right]
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| </math>
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| == See also ==
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| * [[Group testing]]
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| * [[Concatenated code]]
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| * [[Compressed sensing]]
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| == References ==
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| {{Reflist}}
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| == Notes ==
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| # Atri Rudra's course on Error Correcting Codes: Combinatorics, Algorithms, and Applications (Spring 2010), Lectures [http://www.cse.buffalo.edu/~atri/courses/coding-theory/spr10/lectures/lect28.pdf 28], [http://www.cse.buffalo.edu/~atri/courses/coding-theory/spr10/lectures/lect29.pdf 29]. (These notes have mathematically misleading typographical errors.)
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| {{DEFAULTSORT:Disjunct Matrix}}
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| [[Category:Combinatorics]]
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If you're seeking to invest in nice kitchen knives—and are determined to invest in a set—you will not beat the Wüsthof Classic 8-Piece Deluxe Knife Set ($350) for value, overall performance and general presentation. I CAN see it might make sense for some kitchens to pay for a service for the home knives instead of paying a prep cook to do it. But that would prove the point about a line chef or any of the CdP from getting theirs completed. A further situation is that in a genuine kitchen, an ambitious commis or prep cook usually does it ahead of his shift starts to show how committed he is. As a result it fees zero manhours to get the property knives done. Then comes the tools you use for cooking.
Waste processing centers use huge, overhead magnets to separate and extract ferrous metals from trash. Wrap your kitchen knives utilizing cardboard or several layers of newspaper as described in Step 1 of the prior section. Drop off the container with the knives at a recycling center in your area. Do not leave your kitchen knives in curbside recycling bins. Study our guide for buying the ideal kitchen knives.
I consequently chose the Calphalon knife that I use and purchased a new one to assure it would be tested in the exact same out-of-the-box condition. The only adjust essential for the ceramic knives was a modest force was essential to advance the knives. The ceramic knives weigh substantially less than steeland hence the weight of the knife itself is not enough to complete the reduce.
When you adored this informative article as well as you desire to get more information about Taylors Eye Witness 5 Piece Kitchen Knife Set Reviews kindly stop by our own web site. The Chef's knife is one of the most applied kitchen knives and can be used for all the things from chopping to slicing fruits and vegetables. Most chef's knives have a broad blade that curves upward towards the tip to let the knife to rock for fine mincing. Chef's knives come in blade lengths of 6, 8, ten, and 12 inches. Bread knives generally have eight to 9 inch blades with serrated edges for cutting through thick, difficult crust. Utility knives are mid-sized knives employed for miscellaneous cutting.
Forged knives are typically heavier than stamped knives, giving you better excellent. There will be numerous kinds of knives integrated in every single Kitchen Devil Knife Set Review knife set. Identifying the certain knives every set consists of will be pretty helpful in deciding upon the one that will most effective serve your demands. These varieties of kitchen knives, compared to their Western produced counterparts, are quite sharp with out weighing you down.
That is fairly a recommendation, and for anyone who is familiar with other Victorinox merchandise (and/or Yamaha guitars), it seems very accurate that the Swiss talent in building knives is noteworthy. I look forward to getting able to use the best knife in town when it arrives, soon after I have stressed to my husband that as a lot as he may perhaps discover to enjoy it, it ought to keep house. I intend to choose up an Asian-style butcher knife as nicely, immediately after observing its use on tv programs.
valuable issue I like to tell you is that in the Amazon web site also offers a develop-a-set block, exactly where you can pick from a list to produce your own set that fits the block ( I feel is a terrific notion by Wusthof ). The rest of the Wusthof classic knife sets are sold as person pieces so that you can generate a set with any knife listed at this site. Thereby the empty slots will leave you free to go about selecting the knives that you want to gather and use. Most knives are dishwasher safe.