Matrix elements combination - algorithm

There is a m x n array, I need to output each possible combination Of each line's element. For example, for array{{1,2,3},{4,5,6}}, I need to output{{1,4},{1,5},{1,6},{2,4},{2,5},{2,6},{3,4},{3,5},{3,6}}.
I think there should be a m loop to solve this. For the example above, I wrote the code:
int[,] array = new int[,] {{1, 2, 3}, {4, 5, 6}};
for (var i = 0; i < 3; i++)
{
for (var j = 0; j < 3; j++)
{
Console.WriteLine($"{{{array[0, i]},{array[1, j]}}}");
}
}
With m changes, the number of for loop also changes. But m is unknown when I write the code. How can I solve it?

Maintain a list of active combinations c. Initialize c to be the array's first row. Then iterate every additional row and update c. Basically, you augment each of the current combinations with each of the row's items. Here is some pseudo code:
c = array[0]; //read: the first row of the array
for(var i = 1; i < m; ++i) { //iterate all rows
var c_modified = [];
for(var j = 0; j < n; ++j) { //iterate all row entries
for(var k = 0; k < c.length; ++k) { //iterate all entries of c
add c[k].array[i, j] to c_modified; // . represents concatenation
}
}
c = c_modified;
}

This combination of elements (n^m sets) is called Cartesian product. There are ready-to-use functions for its generation in some language libraries
I believe that the simplest code is recursive one.
type
TArr2D = TArray<TArray<Integer>>;
procedure CartesianProduct(const A: TArr2D; Line: Integer; Reslt: TArray<Integer>);
var
i: integer;
begin
if Line > High(A) then
Memo1.Lines.Add(ArrayToString(Reslt)) // output m-element set
else
for i in A[Line] do
CartesianProduct(A, Line + 1, Reslt + [i]); // include element in set
end;
var
A: TArr2D;
n, m, i, j: Integer;
begin
m := 3;
n := 3;
SetLength(A, m, n);
for j := 0 to m - 1 do
for i := 0 to n - 1 do
A[j, i] := j * n + i;
//0 1 2
//3 4 5
//6 7 8
CartesianProduct(A, 0, []);
gives
0 3 6
0 3 7
0 3 8
0 4 6
0 4 7
0 4 8
0 5 6
0 5 7
0 5 8
1 3 6
1 3 7
1 3 8
1 4 6
1 4 7
1 4 8
1 5 6
1 5 7
1 5 8
2 3 6
2 3 7
2 3 8
2 4 6
2 4 7
2 4 8
2 5 6
2 5 7
2 5 8

Related

How would one solve the staircase problem recursively with a variable number of steps?

The problem of determining the n amount of ways to climb a staircase given you can take 1 or 2 steps is well known with the Fibonacci sequencing solution being very clear. However how exactly could one solve this recursively if you also assume that you can take a variable M amount of steps?
I tried to make a quick mockup of this algorithm in typescript with
function counter(n: number, h: number){
console.log(`counter(n=${n},h=${h})`);
let sum = 0
if(h<1) return 0;
sum = 1
if (n>h) {
n = h;
}
if (n==h) {
sum = Math.pow(2, h-1)
console.log(`return sum=${sum}, pow(2,${h-1}) `)
return sum
}
for (let c = 1; c <= h; c++) {
console.log(`c=${c}`)
sum += counter(n, h-c);
console.log(`sum=${sum}`)
}
console.log(`return sum=${sum}`)
return sum;
}
let result = counter (2, 4);
console.log(`result=${result}`)
but unfortunately this doesn't seem to work for most cases where the height is not equal to the number of steps one could take.
I think this could be solved with recursive DP.
vector<vector<int>> dp2; //[stair count][number of jumps]
int stair(int c, int p) {
int& ret = dp2[c][p];
if (ret != -1) return ret; //If you've already done same search, return saved result
if (c == n) { //If you hit the last stair, return 1
return ret = 1;
}
int s1 = 0, s2 = 0;
if (p < m) { //If you can do more jumps, make recursive call
s1 = stair(c + 1, p + 1);
if (c + 2 <= n) { //+2 stairs can jump over the last stair. That shouldn't happen.
s2 = stair(c + 2, p + 1);
}
}
return ret = s1 + s2; //Final result will be addition of +1 stair methods and +2 methods
}
int main()
{
ios::sync_with_stdio(0); cin.tie(0); cout.tie(0);
cin >> n >> m; dp2 = vector<vector<int>>(n + 1, vector<int>(m + 1, -1));
for (int i = 1; i <= m; i++) {
dp2[n][i] = 1; //All last stair method count should be 1, because there is no more after.
}
cout << stair(0, 0) << "\n";
return 0;
}
Example IO 1
5 5
8
// 1 1 1 1 1
// 1 1 1 2
// 1 1 2 1
// 1 2 1 1
// 2 1 1 1
// 1 2 2
// 2 1 2
// 2 2 1
Example IO 2
5 4
7
// 1 1 1 2
// 1 1 2 1
// 1 2 1 1
// 2 1 1 1
// 1 2 2
// 2 1 2
// 2 2 1
Example IO 3
5 3
3
// 1 2 2
// 2 1 2
// 2 2 1

Gold Mine Problem - Sequence of for loops

Gold mine problem. Following sequence for loop is giving correct result.
//see link for other code
static int getMaxGold(int gold[][], int m, int n) {
//see link for other code
for (int col = n-1; col >= 0; col--) {
for (int row = 0; row < m; row++) {
int right = (col == n-1) ? 0 : goldTable[row][col+1];
int right_up = (row == 0 || col == n-1) ? 0 : goldTable[row-1][col+1];
int right_down = (row == m-1 || col == n-1) ? 0 : goldTable[row+1][col+1];
goldTable[row][col] = gold[row][col] + Math.max(right, Math.max(right_up, right_down));
}
}
}
//see link for other code
While other way round does not give the expected result. For example
for (int col = 0; col < n; col ++) {
for (int row = 0; row < m; row++) {
//same code to calculate right, rightUp and rightDown
}
}
Any explanation for this behaviour?
You don't need to store a whole matrix.
When you build the table, you just need to keep the last layer you processed.
In your recursion, there is diagonally right, or right, so the layer is a column because to compute the value of some cell, you need to know three values (on its right)
You conclude (as spotted by Damien already) that you start from the rightmost column, then to compute the value of every cells of the n-1 column, you only need to know the nth column (which you luckily computed already)
In below example. m_ij refers to i-th line, j-th column. (e.g m_01 == 2, m_10 = 5)
1 2 3 4
5 6 7 8
9 1 2 3
4 5 6 3
The last column is {4,8,3,3}
To compute the max value for m_02 you need to choose between 4 and 8
3 - 4
\
8
m_02 = 3 + 8 = 11
To compute the max value of m_12 you need to choose between 4, 8 and 3
4
/
7 - 8
\
3
m_12 = 7 + 8 = 15
Skipping stuff
m_22 = 2 + 8 = 10
m_32 = 6 + 3 = 9
Now you know the max value for each square of the third column
1 2 11 .
5 6 15 .
9 1 10 .
4 5 9 .
You do the same for m_10, m_11, ...
idem
m_01 = 2 + max(11, 15) = 17
m_11 = 6 + 15
m_21 = 1 + 15
m_31 = 5 + 10
Left to process is thus
1 17
5 21
9 16
4 15
Then
1+21
5+21
9+21
4+16
And finally score = max(22, 26, 30, 20)
As you have noticed you only need to keep track of the last processed column. Not a whole table of computation. And the last processed column must start from the right and always be the rightmost one...
I don't think an implem is relevant to help you understand but in case
const s = `
1 2 3 4
5 6 7 8
9 1 2 3
4 5 6 3`
const m = s.trim().split('\n').map(x => x.trim().split(' ').map(y => parseInt(y)))
let layer = [0, 0, 0, 0]
for (let j = 3; j >= 0; --j) {
const nextLayer = []
for (let i = 0; i < 4; ++i) {
nextLayer[i] = m[i][j] + Math.max(
layer[i-1] || 0, // we default undefined value as 0 supposing s only holds positive coefficient
layer[i],
layer[i+1] || 0
)
}
layer = nextLayer
}
console.log(Math.max(...layer))

Is there a function to generate a specific n Multichoose r combination, given the index number?

For example, 3 multichoose 2 has the following combinations:
i combo
0 = [0,0]
1 = [0,1]
2 = [0,2]
3 = [1,1]
4 = [1,2]
5 = [2,2]
Could a function be written whose arguments are n,r,i and returns the combination in question, without iterating through every combination before it?
Could a function be written whose arguments are n,r,i and returns the combination in question, without iterating through every combination before it?
Yes. We have to do a little counting to get at the heart of this problem. To better illustrate how this can be broken down into very simple smaller problems, we will look at a larger example. Consider all combinations of 5 chosen 3 at a time with no repeats (we will say from here on out 5 choose 3).
[,1] [,2] [,3]
[1,] 1 2 3
[2,] 1 2 4
[3,] 1 2 5
[4,] 1 3 4
[5,] 1 3 5
[6,] 1 4 5
[7,] 2 3 4
[8,] 2 3 5
[9,] 2 4 5
[10,] 3 4 5
Notice the first 6 rows. If we remove the first column of these 6 rows and subtract 1 from every element, we obtain:
[,1] [,2] [,1] [,2]
[1,] 2 3 [1,] 1 2
[2,] 2 4 subtract 1 [2,] 1 3
[3,] 2 5 --->>>> [3,] 1 4
[4,] 3 4 [4,] 2 3
[5,] 3 5 [5,] 2 4
[6,] 4 5 [6,] 3 4
The matrix on the right is precisely all of the combinations of 4 choose 2. Continuing on, we see that the "second" group (i.e. rows 7 through 9 of the original matrix) also looks to have order:
[,1] [,2] [,1] [,2]
[1,] 3 4 [1,] 1 2
[2,] 3 5 subtract 2 [2,] 1 3
[3,] 4 5 --->>>> [3,] 2 3
This is simply 3 choose 2. We are starting to see a pattern unfold. Namely, that all combinations of smaller n and r are contained in our parent combinations. This pattern continues as we move to the right. All that is left is to keep up with which combination we are after.
Below is the above algorithm written out in C++ (N.B. there isn't any data validation):
template <typename T>
double nChooseK(T n, T k) {
// Returns number of k-combinations from n elements.
// Mathematically speaking, we have: n!/(k!*(n-k)!)
if (k == n || k == 0)
return 1;
else if (k > n || n < 0)
return 0;
double nCk;
double temp = 1;
for (int i = 1; i <= k; i++)
temp *= (double) (n - k + i) / i;
nCk = std::round(temp);
return nCk;
}
std::vector<int> nthCombination(int n, int r, double i) {
int j = 0, n1 = n - 1, r1 = r - 1;
double temp, index1 = i, index2 = i;
std::vector<int> res(r);
for (int k = 0; k < r; k++) {
temp = nChooseK(n1, r1);
while (temp <= index1) {
index2 -= nChooseK(n1, r1);
n1--;
j++;
temp += nChooseK(n1, r1);
}
res[k] = j;
n1--;
r1--;
j++;
index1 = index2;
}
return res;
}
Calling it on our example above with 5 choose 3 we obtain:
nthCombination(5, 3, 0) -->> 0 1 2
nthCombination(5, 3, 1) -->> 0 1 3
nthCombination(5, 3, 2) -->> 0 1 4
nthCombination(5, 3, 3) -->> 0 2 3
nthCombination(5, 3, 4) -->> 0 2 4
nthCombination(5, 3, 5) -->> 0 3 4
nthCombination(5, 3, 6) -->> 1 2 3
nthCombination(5, 3, 7) -->> 1 2 4
nthCombination(5, 3, 8) -->> 1 3 4
nthCombination(5, 3, 9) -->> 2 3 4
This approach is very efficient as well. Below, we get the billionth combination of 40 choose 20 (which generates more than 100 billion combinations) instantly:
// N.B. base zero so we need to subtract 1
nthCombination(40, 20, 1000000000 - 1) -->>
0 1 2 3 4 5 8 9 14 16 18 20 22 23 31 33 34 35 38 39
Edit
As the OP points out in the comments, they gave an example with repeats. The solution is very similar and it breaks down to counting. We first need a counting function similar to nChooseK but that considers repeats. The function below does just that:
double combsWithReps(int n, int r) {
// For combinations where repetition is allowed, this
// function returns the number of combinations for
// a given n and r. The resulting vector, "triangleVec"
// resembles triangle numbers. In fact, this vector
// is obtained in a very similar method as generating
// triangle numbers, albeit in a repeating fashion.
if (r == 0)
return 1;
int i, k;
std::vector<double> triangleVec(n);
std::vector<double> temp(n);
for (i = 0; i < n; i++)
triangleVec[i] = i+1;
for (i = 1; i < r; i++) {
for (k = 1; k <= n; k++)
temp[k-1] = std::accumulate(triangleVec.begin(), triangleVec.begin() + k, 0.0);
triangleVec = temp;
}
return triangleVec[n-1];
}
And here is the function that generates the ith combination with repeats.
std::vector<int> nthCombWithRep(int n, int r, double i) {
int j = 0, n1 = n, r1 = r - 1;
double temp, index1 = i, index2 = i;
std::vector<int> res(r);
for (int k = 0; k < r; k++) {
temp = combsWithReps(n1, r1);
while (temp <= index1) {
index2 -= combsWithReps(n1, r1);
n1--;
j++;
temp += combsWithReps(n1, r1);
}
res[k] = j;
r1--;
index1 = index2;
}
return res;
}
It is very similar to the first function above. You will notice that n1-- and j++ are removed from the end of the function and also that n1 is initialized to n instead of n - 1.
Here is the above example:
nthCombWithRep(40, 20, 1000000000 - 1) -->>
0 0 0 0 0 0 0 0 0 0 0 4 5 6 8 9 12 18 18 31

How do we Construct LCP-LR array from LCP array?

To find the number of occurrences of a given string P ( length m ) in a text T ( length N )
We must use binary search against the suffix array of T.
The issue with using standard binary search ( without the LCP information ) is that in each of the O(log N) comparisons you need to make, you compare P to the current entry of the suffix array, which means a full string comparison of up to m characters. So the complexity is O(m*log N).
The LCP-LR array helps improve this to O(m+log N).
know more
How we precompute LCP-LR array from LCP array?
And How does LCP-LR help in finding the number of occurrences of a pattern?
Please Explain the Algorithm with Example
Thank you
// note that arrSize is O(n)
// int arrSize = 2 * 2 ^ (log(N) + 1) + 1; // start from 1
// LCP = new int[N];
// fill the LCP...
// LCP_LR = new int[arrSize];
// memset(LCP_LR, maxValueOfInteger, arrSize);
//
// init: buildLCP_LR(1, 1, N);
// LCP_LR[1] == [1..N]
// LCP_LR[2] == [1..N/2]
// LCP_LR[3] == [N/2+1 .. N]
// rangeI = LCP_LR[i]
// rangeILeft = LCP_LR[2 * i]
// rangeIRight = LCP_LR[2 * i + 1]
// ..etc
void buildLCP_LR(int index, int low, int high)
{
if(low == high)
{
LCP_LR[index] = LCP[low];
return;
}
int mid = (low + high) / 2;
buildLCP_LR(2*index, low, mid);
buildLCP_LR(2*index+1, mid + 1, high);
LCP_LR[index] = min(LCP_LR[2*index], LCP_LR[2*index + 1]);
}
Reference: https://stackoverflow.com/a/28385677/1428052
Not having enough reps to comment so posting. Is anybody able to create the LCP-LR using #Abhijeet Ashok Muneshwar solution. For ex for text- mississippi the Suffix array-
0 1 2 3 4 5 6 7 8 9 10
10 7 1 4 0 9 8 3 6 2 5
The LCP array will be
0 1 2 3 4 5 6 7 8 9 10
1 1 4 0 0 1 0 2 1 3 0
And LCP-LR will be
0 1 2 3 4 5 6 7 8 9 10
1 1 0 4 0 0 0 0 0 1 3
But the LCP-LR obtained using the code is not same as above.
To the method buildLCP_LR i am passing index=0, low=0, high=n

Quicksort algorithm with element in the middle as pivot

I had to do this little task where I had to sort an array 'by hand' like quicksort does. There is one specific point (the recursive one) where I am not sure if my solution is
right. Would be nice if anyone could look through this!
Initial sequence: 7 4 6 8 9 1 3 2
Solution (i = left index, x = pivot, j = right index):
[Pivot-index = (i+j)/2]
Sort for positions 0 to 7:
i x j
7 4 6 8 9 1 3 2
(swap 8 and 2)
i j
7 4 6 8 9 1 3 2
i j
7 4 6 2 9 1 3 8
(swap 9 and 3)
i
j
7 4 6 2 3 1 9 8
Sort for positions 0 to 5:
i x j
7 4 6 2 3 1 9 8
(swap 7 and 1)
i j
1 4 6 2 3 7 9 8
(swap 6 and 3)
i
j
1 4 3 2 6 7 9 8
Sort for positions 0 to 3:
i x j
1 4 3 2 6 7 9 8
(swap 4 and 2)
i
j
1 2 3 4 6 7 9 8
Sort for positions 0 to 2:
i x j
1 2 3 4 6 7 9 8
(swap 2 'and' 2)
j i
1 2 3 4 6 7 9 8
Sort for positions 6 to 7 (from first split - not sure here!)
i j
x
1 2 3 4 6 7 9 8
(swap 9 and 8)
j i
1 2 3 4 6 7 8 9
Used code:
public class QuickSort {
public static void sort (int[] a) { // public method
quicksort(a, 0, a.length-1); // starts private method
}
private static void quicksort (int[] a, int left, int right) {
int tmp; // temporary param
int i = left; // left index
int j = right; // right index
int middle = (left + right) / 2; // middle position
int x = a[middle]; // pivot element
do {
while (a[i] < x) i++; // x works as break
while (a[j] > x) j--; // x works as break
if (i <= j) {
tmp = a[i]; // temporary storage
a[i] = a[j]; // a[i] and
a[j] = tmp; // a[j] get swapped
i++;
j--;
}
} while (i <= j);
// all elements on the left side of the array are smaller than
// all elements in the right side of the array
if (left < j) quicksort(a, left, j); // sort left side
if (i < right) quicksort(a, i, right); // sort right side
}
}

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